qemu/include/block/block_int.h

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/*
* QEMU System Emulator block driver
*
* Copyright (c) 2003 Fabrice Bellard
*
* Permission is hereby granted, free of charge, to any person obtaining a copy
* of this software and associated documentation files (the "Software"), to deal
* in the Software without restriction, including without limitation the rights
* to use, copy, modify, merge, publish, distribute, sublicense, and/or sell
* copies of the Software, and to permit persons to whom the Software is
* furnished to do so, subject to the following conditions:
*
* The above copyright notice and this permission notice shall be included in
* all copies or substantial portions of the Software.
*
* THE SOFTWARE IS PROVIDED "AS IS", WITHOUT WARRANTY OF ANY KIND, EXPRESS OR
* IMPLIED, INCLUDING BUT NOT LIMITED TO THE WARRANTIES OF MERCHANTABILITY,
* FITNESS FOR A PARTICULAR PURPOSE AND NONINFRINGEMENT. IN NO EVENT SHALL
* THE AUTHORS OR COPYRIGHT HOLDERS BE LIABLE FOR ANY CLAIM, DAMAGES OR OTHER
* LIABILITY, WHETHER IN AN ACTION OF CONTRACT, TORT OR OTHERWISE, ARISING FROM,
* OUT OF OR IN CONNECTION WITH THE SOFTWARE OR THE USE OR OTHER DEALINGS IN
* THE SOFTWARE.
*/
#ifndef BLOCK_INT_H
#define BLOCK_INT_H
#include "block/accounting.h"
#include "block/block.h"
#include "block/aio-wait.h"
#include "qemu/queue.h"
#include "qemu/coroutine.h"
#include "qemu/stats64.h"
#include "qemu/timer.h"
#include "qemu/hbitmap.h"
#include "block/snapshot.h"
#include "qemu/throttle.h"
#define BLOCK_FLAG_LAZY_REFCOUNTS 8
#define BLOCK_OPT_SIZE "size"
#define BLOCK_OPT_ENCRYPT "encryption"
#define BLOCK_OPT_ENCRYPT_FORMAT "encrypt.format"
#define BLOCK_OPT_COMPAT6 "compat6"
#define BLOCK_OPT_HWVERSION "hwversion"
#define BLOCK_OPT_BACKING_FILE "backing_file"
#define BLOCK_OPT_BACKING_FMT "backing_fmt"
#define BLOCK_OPT_CLUSTER_SIZE "cluster_size"
#define BLOCK_OPT_TABLE_SIZE "table_size"
#define BLOCK_OPT_PREALLOC "preallocation"
#define BLOCK_OPT_SUBFMT "subformat"
#define BLOCK_OPT_COMPAT_LEVEL "compat"
#define BLOCK_OPT_LAZY_REFCOUNTS "lazy_refcounts"
#define BLOCK_OPT_ADAPTER_TYPE "adapter_type"
#define BLOCK_OPT_REDUNDANCY "redundancy"
#define BLOCK_OPT_NOCOW "nocow"
#define BLOCK_OPT_OBJECT_SIZE "object_size"
#define BLOCK_OPT_REFCOUNT_BITS "refcount_bits"
#define BLOCK_OPT_DATA_FILE "data_file"
#define BLOCK_OPT_DATA_FILE_RAW "data_file_raw"
#define BLOCK_PROBE_BUF_SIZE 512
enum BdrvTrackedRequestType {
BDRV_TRACKED_READ,
BDRV_TRACKED_WRITE,
BDRV_TRACKED_DISCARD,
BDRV_TRACKED_TRUNCATE,
};
typedef struct BdrvTrackedRequest {
BlockDriverState *bs;
int64_t offset;
uint64_t bytes;
enum BdrvTrackedRequestType type;
bool serialising;
int64_t overlap_offset;
uint64_t overlap_bytes;
QLIST_ENTRY(BdrvTrackedRequest) list;
Coroutine *co; /* owner, used for deadlock detection */
CoQueue wait_queue; /* coroutines blocked on this request */
struct BdrvTrackedRequest *waiting_for;
} BdrvTrackedRequest;
struct BlockDriver {
const char *format_name;
int instance_size;
/* set to true if the BlockDriver is a block filter. Block filters pass
* certain callbacks that refer to data (see block.c) to their bs->file if
* the driver doesn't implement them. Drivers that do not wish to forward
* must implement them and return -ENOTSUP.
*/
bool is_filter;
/* for snapshots block filter like Quorum can implement the
* following recursive callback.
* It's purpose is to recurse on the filter children while calling
* bdrv_recurse_is_first_non_filter on them.
* For a sample implementation look in the future Quorum block filter.
*/
bool (*bdrv_recurse_is_first_non_filter)(BlockDriverState *bs,
BlockDriverState *candidate);
int (*bdrv_probe)(const uint8_t *buf, int buf_size, const char *filename);
int (*bdrv_probe_device)(const char *filename);
/* Any driver implementing this callback is expected to be able to handle
* NULL file names in its .bdrv_open() implementation */
void (*bdrv_parse_filename)(const char *filename, QDict *options, Error **errp);
/* Drivers not implementing bdrv_parse_filename nor bdrv_open should have
* this field set to true, except ones that are defined only by their
* child's bs.
* An example of the last type will be the quorum block driver.
*/
bool bdrv_needs_filename;
/* Set if a driver can support backing files */
bool supports_backing;
/* For handling image reopen for split or non-split files */
int (*bdrv_reopen_prepare)(BDRVReopenState *reopen_state,
BlockReopenQueue *queue, Error **errp);
void (*bdrv_reopen_commit)(BDRVReopenState *reopen_state);
void (*bdrv_reopen_abort)(BDRVReopenState *reopen_state);
void (*bdrv_join_options)(QDict *options, QDict *old_options);
int (*bdrv_open)(BlockDriverState *bs, QDict *options, int flags,
Error **errp);
/* Protocol drivers should implement this instead of bdrv_open */
int (*bdrv_file_open)(BlockDriverState *bs, QDict *options, int flags,
Error **errp);
void (*bdrv_close)(BlockDriverState *bs);
int coroutine_fn (*bdrv_co_create)(BlockdevCreateOptions *opts,
Error **errp);
int coroutine_fn (*bdrv_co_create_opts)(const char *filename,
QemuOpts *opts,
Error **errp);
int (*bdrv_make_empty)(BlockDriverState *bs);
/*
* Refreshes the bs->exact_filename field. If that is impossible,
* bs->exact_filename has to be left empty.
*/
void (*bdrv_refresh_filename)(BlockDriverState *bs);
/*
* Gathers the open options for all children into @target.
* A simple format driver (without backing file support) might
* implement this function like this:
*
* QINCREF(bs->file->bs->full_open_options);
* qdict_put(target, "file", bs->file->bs->full_open_options);
*
* If not specified, the generic implementation will simply put
* all children's options under their respective name.
*
* @backing_overridden is true when bs->backing seems not to be
* the child that would result from opening bs->backing_file.
* Therefore, if it is true, the backing child's options should be
* gathered; otherwise, there is no need since the backing child
* is the one implied by the image header.
*
* Note that ideally this function would not be needed. Every
* block driver which implements it is probably doing something
* shady regarding its runtime option structure.
*/
void (*bdrv_gather_child_options)(BlockDriverState *bs, QDict *target,
bool backing_overridden);
/*
* Returns an allocated string which is the directory name of this BDS: It
* will be used to make relative filenames absolute by prepending this
* function's return value to them.
*/
char *(*bdrv_dirname)(BlockDriverState *bs, Error **errp);
/* aio */
BlockAIOCB *(*bdrv_aio_preadv)(BlockDriverState *bs,
uint64_t offset, uint64_t bytes, QEMUIOVector *qiov, int flags,
BlockCompletionFunc *cb, void *opaque);
BlockAIOCB *(*bdrv_aio_pwritev)(BlockDriverState *bs,
uint64_t offset, uint64_t bytes, QEMUIOVector *qiov, int flags,
BlockCompletionFunc *cb, void *opaque);
BlockAIOCB *(*bdrv_aio_flush)(BlockDriverState *bs,
BlockCompletionFunc *cb, void *opaque);
BlockAIOCB *(*bdrv_aio_pdiscard)(BlockDriverState *bs,
int64_t offset, int bytes,
BlockCompletionFunc *cb, void *opaque);
int coroutine_fn (*bdrv_co_readv)(BlockDriverState *bs,
int64_t sector_num, int nb_sectors, QEMUIOVector *qiov);
/**
* @offset: position in bytes to read at
* @bytes: number of bytes to read
* @qiov: the buffers to fill with read data
* @flags: currently unused, always 0
*
* @offset and @bytes will be a multiple of 'request_alignment',
* but the length of individual @qiov elements does not have to
* be a multiple.
*
* @bytes will always equal the total size of @qiov, and will be
* no larger than 'max_transfer'.
*
* The buffer in @qiov may point directly to guest memory.
*/
int coroutine_fn (*bdrv_co_preadv)(BlockDriverState *bs,
uint64_t offset, uint64_t bytes, QEMUIOVector *qiov, int flags);
int coroutine_fn (*bdrv_co_preadv_part)(BlockDriverState *bs,
uint64_t offset, uint64_t bytes,
QEMUIOVector *qiov, size_t qiov_offset, int flags);
int coroutine_fn (*bdrv_co_writev)(BlockDriverState *bs,
int64_t sector_num, int nb_sectors, QEMUIOVector *qiov, int flags);
/**
* @offset: position in bytes to write at
* @bytes: number of bytes to write
* @qiov: the buffers containing data to write
* @flags: zero or more bits allowed by 'supported_write_flags'
*
* @offset and @bytes will be a multiple of 'request_alignment',
* but the length of individual @qiov elements does not have to
* be a multiple.
*
* @bytes will always equal the total size of @qiov, and will be
* no larger than 'max_transfer'.
*
* The buffer in @qiov may point directly to guest memory.
*/
int coroutine_fn (*bdrv_co_pwritev)(BlockDriverState *bs,
uint64_t offset, uint64_t bytes, QEMUIOVector *qiov, int flags);
int coroutine_fn (*bdrv_co_pwritev_part)(BlockDriverState *bs,
uint64_t offset, uint64_t bytes,
QEMUIOVector *qiov, size_t qiov_offset, int flags);
/*
* Efficiently zero a region of the disk image. Typically an image format
* would use a compact metadata representation to implement this. This
block: Honor BDRV_REQ_FUA during write_zeroes The block layer has a couple of cases where it can lose Force Unit Access semantics when writing a large block of zeroes, such that the request returns before the zeroes have been guaranteed to land on underlying media. SCSI does not support FUA during WRITESAME(10/16); FUA is only supported if it falls back to WRITE(10/16). But where the underlying device is new enough to not need a fallback, it means that any upper layer request with FUA semantics was silently ignoring BDRV_REQ_FUA. Conversely, NBD has situations where it can support FUA but not ZERO_WRITE; when that happens, the generic block layer fallback to bdrv_driver_pwritev() (or the older bdrv_co_writev() in qemu 2.6) was losing the FUA flag. The problem of losing flags unrelated to ZERO_WRITE has been latent in bdrv_co_do_write_zeroes() since commit aa7bfbff, but back then, it did not matter because there was no FUA flag. It became observable when commit 93f5e6d8 paved the way for flags that can impact correctness, when we should have been using bdrv_co_writev_flags() with modified flags. Compare to commit 9eeb6dd, which got flag manipulation right in bdrv_co_do_zero_pwritev(). Symptoms: I tested with qemu-io with default writethrough cache (which is supposed to use FUA semantics on every write), and targetted an NBD client connected to a server that intentionally did not advertise NBD_FLAG_SEND_FUA. When doing 'write 0 512', the NBD client sent two operations (NBD_CMD_WRITE then NBD_CMD_FLUSH) to get the fallback FUA semantics; but when doing 'write -z 0 512', the NBD client sent only NBD_CMD_WRITE. The fix is do to a cleanup bdrv_co_flush() at the end of the operation if any step in the middle relied on a BDS that does not natively support FUA for that step (note that we don't need to flush after every operation, if the operation is broken into chunks based on bounce-buffer sizing). Each BDS gains a new flag .supported_zero_flags, which parallels the use of .supported_write_flags but only when accessing a zero write operation (the flags MUST be different, because of SCSI having different semantics based on WRITE vs. WRITESAME; and also because BDRV_REQ_MAY_UNMAP only makes sense on zero writes). Also fix some documentation to describe -ENOTSUP semantics, particularly since iscsi depends on those semantics. Down the road, we may want to add a driver where its .bdrv_co_pwritev() honors all three of BDRV_REQ_FUA, BDRV_REQ_ZERO_WRITE, and BDRV_REQ_MAY_UNMAP, and advertise this via bs->supported_write_flags for blocks opened by that driver; such a driver should NOT supply .bdrv_co_write_zeroes nor .supported_zero_flags. But none of the drivers touched in this patch want to do that (the act of writing zeroes is different enough from normal writes to deserve a second callback). Signed-off-by: Eric Blake <eblake@redhat.com> Reviewed-by: Fam Zheng <famz@redhat.com> Acked-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2016-05-04 06:39:07 +08:00
* function pointer may be NULL or return -ENOSUP and .bdrv_co_writev()
* will be called instead.
*/
int coroutine_fn (*bdrv_co_pwrite_zeroes)(BlockDriverState *bs,
int64_t offset, int bytes, BdrvRequestFlags flags);
int coroutine_fn (*bdrv_co_pdiscard)(BlockDriverState *bs,
int64_t offset, int bytes);
/* Map [offset, offset + nbytes) range onto a child of @bs to copy from,
* and invoke bdrv_co_copy_range_from(child, ...), or invoke
* bdrv_co_copy_range_to() if @bs is the leaf child to copy data from.
*
* See the comment of bdrv_co_copy_range for the parameter and return value
* semantics.
*/
int coroutine_fn (*bdrv_co_copy_range_from)(BlockDriverState *bs,
BdrvChild *src,
uint64_t offset,
BdrvChild *dst,
uint64_t dst_offset,
uint64_t bytes,
BdrvRequestFlags read_flags,
BdrvRequestFlags write_flags);
/* Map [offset, offset + nbytes) range onto a child of bs to copy data to,
* and invoke bdrv_co_copy_range_to(child, src, ...), or perform the copy
* operation if @bs is the leaf and @src has the same BlockDriver. Return
* -ENOTSUP if @bs is the leaf but @src has a different BlockDriver.
*
* See the comment of bdrv_co_copy_range for the parameter and return value
* semantics.
*/
int coroutine_fn (*bdrv_co_copy_range_to)(BlockDriverState *bs,
BdrvChild *src,
uint64_t src_offset,
BdrvChild *dst,
uint64_t dst_offset,
uint64_t bytes,
BdrvRequestFlags read_flags,
BdrvRequestFlags write_flags);
/*
* Building block for bdrv_block_status[_above] and
* bdrv_is_allocated[_above]. The driver should answer only
block: Add .bdrv_co_block_status() callback We are gradually moving away from sector-based interfaces, towards byte-based. Now that the block layer exposes byte-based allocation, it's time to tackle the drivers. Add a new callback that operates on as small as byte boundaries. Subsequent patches will then update individual drivers, then finally remove .bdrv_co_get_block_status(). The new code also passes through the 'want_zero' hint, which will allow subsequent patches to further optimize callers that only care about how much of the image is allocated (want_zero is false), rather than full details about runs of zeroes and which offsets the allocation actually maps to (want_zero is true). As part of this effort, fix another part of the documentation: the claim in commit 4c41cb4 that BDRV_BLOCK_ALLOCATED is short for 'DATA || ZERO' is a lie at the block layer (see commit e88ae2264), even though it is how the bit is computed from the driver layer. After all, there are intentionally cases where we return ZERO but not ALLOCATED at the block layer, when we know that a read sees zero because the backing file is too short. Note that the driver interface is thus slightly different than the public interface with regards to which bits will be set, and what guarantees are provided on input. We also add an assertion that any driver using the new callback will make progress (the only time pnum will be 0 is if the block layer already handled an out-of-bounds request, or if there is an error); the old driver interface did not provide this guarantee, which could lead to some inf-loops in drastic corner-case failures. Signed-off-by: Eric Blake <eblake@redhat.com> Reviewed-by: Vladimir Sementsov-Ogievskiy <vsementsov@virtuozzo.com> Reviewed-by: Fam Zheng <famz@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2018-02-14 04:26:41 +08:00
* according to the current layer, and should only need to set
* BDRV_BLOCK_DATA, BDRV_BLOCK_ZERO, BDRV_BLOCK_OFFSET_VALID,
* and/or BDRV_BLOCK_RAW; if the current layer defers to a backing
* layer, the result should be 0 (and not BDRV_BLOCK_ZERO). See
* block.h for the overall meaning of the bits. As a hint, the
* flag want_zero is true if the caller cares more about precise
* mappings (favor accurate _OFFSET_VALID/_ZERO) or false for
* overall allocation (favor larger *pnum, perhaps by reporting
* _DATA instead of _ZERO). The block layer guarantees input
* clamped to bdrv_getlength() and aligned to request_alignment,
* as well as non-NULL pnum, map, and file; in turn, the driver
* must return an error or set pnum to an aligned non-zero value.
*/
block: Add .bdrv_co_block_status() callback We are gradually moving away from sector-based interfaces, towards byte-based. Now that the block layer exposes byte-based allocation, it's time to tackle the drivers. Add a new callback that operates on as small as byte boundaries. Subsequent patches will then update individual drivers, then finally remove .bdrv_co_get_block_status(). The new code also passes through the 'want_zero' hint, which will allow subsequent patches to further optimize callers that only care about how much of the image is allocated (want_zero is false), rather than full details about runs of zeroes and which offsets the allocation actually maps to (want_zero is true). As part of this effort, fix another part of the documentation: the claim in commit 4c41cb4 that BDRV_BLOCK_ALLOCATED is short for 'DATA || ZERO' is a lie at the block layer (see commit e88ae2264), even though it is how the bit is computed from the driver layer. After all, there are intentionally cases where we return ZERO but not ALLOCATED at the block layer, when we know that a read sees zero because the backing file is too short. Note that the driver interface is thus slightly different than the public interface with regards to which bits will be set, and what guarantees are provided on input. We also add an assertion that any driver using the new callback will make progress (the only time pnum will be 0 is if the block layer already handled an out-of-bounds request, or if there is an error); the old driver interface did not provide this guarantee, which could lead to some inf-loops in drastic corner-case failures. Signed-off-by: Eric Blake <eblake@redhat.com> Reviewed-by: Vladimir Sementsov-Ogievskiy <vsementsov@virtuozzo.com> Reviewed-by: Fam Zheng <famz@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2018-02-14 04:26:41 +08:00
int coroutine_fn (*bdrv_co_block_status)(BlockDriverState *bs,
bool want_zero, int64_t offset, int64_t bytes, int64_t *pnum,
int64_t *map, BlockDriverState **file);
/*
* Invalidate any cached meta-data.
*/
void coroutine_fn (*bdrv_co_invalidate_cache)(BlockDriverState *bs,
Error **errp);
block: Inactivate BDS when migration completes So far, live migration with shared storage meant that the image is in a not-really-ready don't-touch-me state on the destination while the source is still actively using it, but after completing the migration, the image was fully opened on both sides. This is bad. This patch adds a block driver callback to inactivate images on the source before completing the migration. Inactivation means that it goes to a state as if it was just live migrated to the qemu instance on the source (i.e. BDRV_O_INACTIVE is set). You're then supposed to continue either on the source or on the destination, which takes ownership of the image. A typical migration looks like this now with respect to disk images: 1. Destination qemu is started, the image is opened with BDRV_O_INACTIVE. The image is fully opened on the source. 2. Migration is about to complete. The source flushes the image and inactivates it. Now both sides have the image opened with BDRV_O_INACTIVE and are expecting the other side to still modify it. 3. One side (the destination on success) continues and calls bdrv_invalidate_all() in order to take ownership of the image again. This removes BDRV_O_INACTIVE on the resuming side; the flag remains set on the other side. This ensures that the same image isn't written to by both instances (unless both are resumed, but then you get what you deserve). This is important because .bdrv_close for non-BDRV_O_INACTIVE images could write to the image file, which is definitely forbidden while another host is using the image. Signed-off-by: Kevin Wolf <kwolf@redhat.com> Reviewed-by: Eric Blake <eblake@redhat.com> Reviewed-by: John Snow <jsnow@redhat.com>
2015-12-22 21:07:08 +08:00
int (*bdrv_inactivate)(BlockDriverState *bs);
/*
* Flushes all data for all layers by calling bdrv_co_flush for underlying
* layers, if needed. This function is needed for deterministic
* synchronization of the flush finishing callback.
*/
int coroutine_fn (*bdrv_co_flush)(BlockDriverState *bs);
/*
* Flushes all data that was already written to the OS all the way down to
* the disk (for example file-posix.c calls fsync()).
*/
int coroutine_fn (*bdrv_co_flush_to_disk)(BlockDriverState *bs);
/*
* Flushes all internal caches to the OS. The data may still sit in a
* writeback cache of the host OS, but it will survive a crash of the qemu
* process.
*/
int coroutine_fn (*bdrv_co_flush_to_os)(BlockDriverState *bs);
/*
* Drivers setting this field must be able to work with just a plain
* filename with '<protocol_name>:' as a prefix, and no other options.
* Options may be extracted from the filename by implementing
* bdrv_parse_filename.
*/
const char *protocol_name;
/*
* Truncate @bs to @offset bytes using the given @prealloc mode
* when growing. Modes other than PREALLOC_MODE_OFF should be
* rejected when shrinking @bs.
*
* If @exact is true, @bs must be resized to exactly @offset.
* Otherwise, it is sufficient for @bs (if it is a host block
* device and thus there is no way to resize it) to be at least
* @offset bytes in length.
*
* If @exact is true and this function fails but would succeed
* with @exact = false, it should return -ENOTSUP.
*/
int coroutine_fn (*bdrv_co_truncate)(BlockDriverState *bs, int64_t offset,
bool exact, PreallocMode prealloc,
Error **errp);
2013-10-29 19:18:58 +08:00
int64_t (*bdrv_getlength)(BlockDriverState *bs);
2013-10-29 19:18:58 +08:00
bool has_variable_length;
int64_t (*bdrv_get_allocated_file_size)(BlockDriverState *bs);
BlockMeasureInfo *(*bdrv_measure)(QemuOpts *opts, BlockDriverState *in_bs,
Error **errp);
2013-10-29 19:18:58 +08:00
int coroutine_fn (*bdrv_co_pwritev_compressed)(BlockDriverState *bs,
uint64_t offset, uint64_t bytes, QEMUIOVector *qiov);
int coroutine_fn (*bdrv_co_pwritev_compressed_part)(BlockDriverState *bs,
uint64_t offset, uint64_t bytes, QEMUIOVector *qiov,
size_t qiov_offset);
int (*bdrv_snapshot_create)(BlockDriverState *bs,
QEMUSnapshotInfo *sn_info);
int (*bdrv_snapshot_goto)(BlockDriverState *bs,
const char *snapshot_id);
int (*bdrv_snapshot_delete)(BlockDriverState *bs,
const char *snapshot_id,
const char *name,
Error **errp);
int (*bdrv_snapshot_list)(BlockDriverState *bs,
QEMUSnapshotInfo **psn_info);
int (*bdrv_snapshot_load_tmp)(BlockDriverState *bs,
const char *snapshot_id,
const char *name,
Error **errp);
int (*bdrv_get_info)(BlockDriverState *bs, BlockDriverInfo *bdi);
ImageInfoSpecific *(*bdrv_get_specific_info)(BlockDriverState *bs,
Error **errp);
BlockStatsSpecific *(*bdrv_get_specific_stats)(BlockDriverState *bs);
int coroutine_fn (*bdrv_save_vmstate)(BlockDriverState *bs,
QEMUIOVector *qiov,
int64_t pos);
int coroutine_fn (*bdrv_load_vmstate)(BlockDriverState *bs,
QEMUIOVector *qiov,
int64_t pos);
int (*bdrv_change_backing_file)(BlockDriverState *bs,
const char *backing_file, const char *backing_fmt);
/* removable device specific */
bool (*bdrv_is_inserted)(BlockDriverState *bs);
void (*bdrv_eject)(BlockDriverState *bs, bool eject_flag);
void (*bdrv_lock_medium)(BlockDriverState *bs, bool locked);
/* to control generic scsi devices */
BlockAIOCB *(*bdrv_aio_ioctl)(BlockDriverState *bs,
unsigned long int req, void *buf,
BlockCompletionFunc *cb, void *opaque);
int coroutine_fn (*bdrv_co_ioctl)(BlockDriverState *bs,
unsigned long int req, void *buf);
/* List of options for creating images, terminated by name == NULL */
QemuOptsList *create_opts;
/*
* If this driver supports reopening images this contains a
* NULL-terminated list of the runtime options that can be
* modified. If an option in this list is unspecified during
* reopen then it _must_ be reset to its default value or return
* an error.
*/
const char *const *mutable_opts;
/*
* Returns 0 for completed check, -errno for internal errors.
* The check results are stored in result.
*/
int coroutine_fn (*bdrv_co_check)(BlockDriverState *bs,
BdrvCheckResult *result,
BdrvCheckMode fix);
int (*bdrv_amend_options)(BlockDriverState *bs, QemuOpts *opts,
BlockDriverAmendStatusCB *status_cb,
void *cb_opaque,
Error **errp);
void (*bdrv_debug_event)(BlockDriverState *bs, BlkdebugEvent event);
/* TODO Better pass a option string/QDict/QemuOpts to add any rule? */
int (*bdrv_debug_breakpoint)(BlockDriverState *bs, const char *event,
const char *tag);
int (*bdrv_debug_remove_breakpoint)(BlockDriverState *bs,
const char *tag);
int (*bdrv_debug_resume)(BlockDriverState *bs, const char *tag);
bool (*bdrv_debug_is_suspended)(BlockDriverState *bs, const char *tag);
void (*bdrv_refresh_limits)(BlockDriverState *bs, Error **errp);
/*
* Returns 1 if newly created images are guaranteed to contain only
* zeros, 0 otherwise.
* Must return 0 if .bdrv_has_zero_init_truncate() returns 0.
*/
int (*bdrv_has_zero_init)(BlockDriverState *bs);
/*
* Returns 1 if new areas added by growing the image with
* PREALLOC_MODE_OFF contain only zeros, 0 otherwise.
*/
int (*bdrv_has_zero_init_truncate)(BlockDriverState *bs);
/* Remove fd handlers, timers, and other event loop callbacks so the event
* loop is no longer in use. Called with no in-flight requests and in
* depth-first traversal order with parents before child nodes.
*/
void (*bdrv_detach_aio_context)(BlockDriverState *bs);
/* Add fd handlers, timers, and other event loop callbacks so I/O requests
* can be processed again. Called with no in-flight requests and in
* depth-first traversal order with child nodes before parent nodes.
*/
void (*bdrv_attach_aio_context)(BlockDriverState *bs,
AioContext *new_context);
/* io queue for linux-aio */
void (*bdrv_io_plug)(BlockDriverState *bs);
void (*bdrv_io_unplug)(BlockDriverState *bs);
/**
* Try to get @bs's logical and physical block size.
* On success, store them in @bsz and return zero.
* On failure, return negative errno.
*/
int (*bdrv_probe_blocksizes)(BlockDriverState *bs, BlockSizes *bsz);
/**
* Try to get @bs's geometry (cyls, heads, sectors)
* On success, store them in @geo and return 0.
* On failure return -errno.
* Only drivers that want to override guest geometry implement this
* callback; see hd_geometry_guess().
*/
int (*bdrv_probe_geometry)(BlockDriverState *bs, HDGeometry *geo);
/**
* bdrv_co_drain_begin is called if implemented in the beginning of a
* drain operation to drain and stop any internal sources of requests in
* the driver.
* bdrv_co_drain_end is called if implemented at the end of the drain.
*
* They should be used by the driver to e.g. manage scheduled I/O
* requests, or toggle an internal state. After the end of the drain new
* requests will continue normally.
*/
void coroutine_fn (*bdrv_co_drain_begin)(BlockDriverState *bs);
void coroutine_fn (*bdrv_co_drain_end)(BlockDriverState *bs);
void (*bdrv_add_child)(BlockDriverState *parent, BlockDriverState *child,
Error **errp);
void (*bdrv_del_child)(BlockDriverState *parent, BdrvChild *child,
Error **errp);
/**
* Informs the block driver that a permission change is intended. The
* driver checks whether the change is permissible and may take other
* preparations for the change (e.g. get file system locks). This operation
* is always followed either by a call to either .bdrv_set_perm or
* .bdrv_abort_perm_update.
*
* Checks whether the requested set of cumulative permissions in @perm
* can be granted for accessing @bs and whether no other users are using
* permissions other than those given in @shared (both arguments take
* BLK_PERM_* bitmasks).
*
* If both conditions are met, 0 is returned. Otherwise, -errno is returned
* and errp is set to an error describing the conflict.
*/
int (*bdrv_check_perm)(BlockDriverState *bs, uint64_t perm,
uint64_t shared, Error **errp);
/**
* Called to inform the driver that the set of cumulative set of used
* permissions for @bs has changed to @perm, and the set of sharable
* permission to @shared. The driver can use this to propagate changes to
* its children (i.e. request permissions only if a parent actually needs
* them).
*
* This function is only invoked after bdrv_check_perm(), so block drivers
* may rely on preparations made in their .bdrv_check_perm implementation.
*/
void (*bdrv_set_perm)(BlockDriverState *bs, uint64_t perm, uint64_t shared);
/*
* Called to inform the driver that after a previous bdrv_check_perm()
* call, the permission update is not performed and any preparations made
* for it (e.g. taken file locks) need to be undone.
*
* This function can be called even for nodes that never saw a
* bdrv_check_perm() call. It is a no-op then.
*/
void (*bdrv_abort_perm_update)(BlockDriverState *bs);
/**
* Returns in @nperm and @nshared the permissions that the driver for @bs
* needs on its child @c, based on the cumulative permissions requested by
* the parents in @parent_perm and @parent_shared.
*
* If @c is NULL, return the permissions for attaching a new child for the
* given @role.
*
* If @reopen_queue is non-NULL, don't return the currently needed
* permissions, but those that will be needed after applying the
* @reopen_queue.
*/
void (*bdrv_child_perm)(BlockDriverState *bs, BdrvChild *c,
const BdrvChildRole *role,
BlockReopenQueue *reopen_queue,
uint64_t parent_perm, uint64_t parent_shared,
uint64_t *nperm, uint64_t *nshared);
bool (*bdrv_co_can_store_new_dirty_bitmap)(BlockDriverState *bs,
const char *name,
uint32_t granularity,
Error **errp);
int (*bdrv_co_remove_persistent_dirty_bitmap)(BlockDriverState *bs,
const char *name,
Error **errp);
/**
* Register/unregister a buffer for I/O. For example, when the driver is
* interested to know the memory areas that will later be used in iovs, so
* that it can do IOMMU mapping with VFIO etc., in order to get better
* performance. In the case of VFIO drivers, this callback is used to do
* DMA mapping for hot buffers.
*/
void (*bdrv_register_buf)(BlockDriverState *bs, void *host, size_t size);
void (*bdrv_unregister_buf)(BlockDriverState *bs, void *host);
QLIST_ENTRY(BlockDriver) list;
/* Pointer to a NULL-terminated array of names of strong options
* that can be specified for bdrv_open(). A strong option is one
* that changes the data of a BDS.
* If this pointer is NULL, the array is considered empty.
* "filename" and "driver" are always considered strong. */
const char *const *strong_runtime_opts;
};
static inline bool block_driver_can_compress(BlockDriver *drv)
{
return drv->bdrv_co_pwritev_compressed ||
drv->bdrv_co_pwritev_compressed_part;
}
typedef struct BlockLimits {
/* Alignment requirement, in bytes, for offset/length of I/O
* requests. Must be a power of 2 less than INT_MAX; defaults to
* 1 for drivers with modern byte interfaces, and to 512
* otherwise. */
uint32_t request_alignment;
block: Cater to iscsi with non-power-of-2 discard Dell Equallogic iSCSI SANs have a very unusual advertised geometry: $ iscsi-inq -e 1 -c $((0xb0)) iscsi://XXX/0 wsnz:0 maximum compare and write length:1 optimal transfer length granularity:0 maximum transfer length:0 optimal transfer length:0 maximum prefetch xdread xdwrite transfer length:0 maximum unmap lba count:30720 maximum unmap block descriptor count:2 optimal unmap granularity:30720 ugavalid:1 unmap granularity alignment:0 maximum write same length:30720 which says that both the maximum and the optimal discard size is 15M. It is not immediately apparent if the device allows discard requests not aligned to the optimal size, nor if it allows discards at a finer granularity than the optimal size. I tried to find details in the SCSI Commands Reference Manual Rev. A on what valid values of maximum and optimal sizes are permitted, but while that document mentions a "Block Limits VPD Page", I couldn't actually find documentation of that page or what values it would have, or if a SCSI device has an advertisement of its minimal unmap granularity. So it is not obvious to me whether the Dell Equallogic device is compliance with the SCSI specification. Fortunately, it is easy enough to support non-power-of-2 sizing, even if it means we are less efficient than truly possible when targetting that device (for example, it means that we refuse to unmap anything that is not a multiple of 15M and aligned to a 15M boundary, even if the device truly does support a smaller granularity where unmapping actually works). Reported-by: Peter Lieven <pl@kamp.de> Signed-off-by: Eric Blake <eblake@redhat.com> Message-Id: <1469129688-22848-5-git-send-email-eblake@redhat.com> Acked-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Paolo Bonzini <pbonzini@redhat.com>
2016-07-22 03:34:48 +08:00
/* Maximum number of bytes that can be discarded at once (since it
* is signed, it must be < 2G, if set). Must be multiple of
* pdiscard_alignment, but need not be power of 2. May be 0 if no
* inherent 32-bit limit */
int32_t max_pdiscard;
block: Cater to iscsi with non-power-of-2 discard Dell Equallogic iSCSI SANs have a very unusual advertised geometry: $ iscsi-inq -e 1 -c $((0xb0)) iscsi://XXX/0 wsnz:0 maximum compare and write length:1 optimal transfer length granularity:0 maximum transfer length:0 optimal transfer length:0 maximum prefetch xdread xdwrite transfer length:0 maximum unmap lba count:30720 maximum unmap block descriptor count:2 optimal unmap granularity:30720 ugavalid:1 unmap granularity alignment:0 maximum write same length:30720 which says that both the maximum and the optimal discard size is 15M. It is not immediately apparent if the device allows discard requests not aligned to the optimal size, nor if it allows discards at a finer granularity than the optimal size. I tried to find details in the SCSI Commands Reference Manual Rev. A on what valid values of maximum and optimal sizes are permitted, but while that document mentions a "Block Limits VPD Page", I couldn't actually find documentation of that page or what values it would have, or if a SCSI device has an advertisement of its minimal unmap granularity. So it is not obvious to me whether the Dell Equallogic device is compliance with the SCSI specification. Fortunately, it is easy enough to support non-power-of-2 sizing, even if it means we are less efficient than truly possible when targetting that device (for example, it means that we refuse to unmap anything that is not a multiple of 15M and aligned to a 15M boundary, even if the device truly does support a smaller granularity where unmapping actually works). Reported-by: Peter Lieven <pl@kamp.de> Signed-off-by: Eric Blake <eblake@redhat.com> Message-Id: <1469129688-22848-5-git-send-email-eblake@redhat.com> Acked-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Paolo Bonzini <pbonzini@redhat.com>
2016-07-22 03:34:48 +08:00
/* Optimal alignment for discard requests in bytes. A power of 2
* is best but not mandatory. Must be a multiple of
* bl.request_alignment, and must be less than max_pdiscard if
* that is set. May be 0 if bl.request_alignment is good enough */
uint32_t pdiscard_alignment;
block: Cater to iscsi with non-power-of-2 discard Dell Equallogic iSCSI SANs have a very unusual advertised geometry: $ iscsi-inq -e 1 -c $((0xb0)) iscsi://XXX/0 wsnz:0 maximum compare and write length:1 optimal transfer length granularity:0 maximum transfer length:0 optimal transfer length:0 maximum prefetch xdread xdwrite transfer length:0 maximum unmap lba count:30720 maximum unmap block descriptor count:2 optimal unmap granularity:30720 ugavalid:1 unmap granularity alignment:0 maximum write same length:30720 which says that both the maximum and the optimal discard size is 15M. It is not immediately apparent if the device allows discard requests not aligned to the optimal size, nor if it allows discards at a finer granularity than the optimal size. I tried to find details in the SCSI Commands Reference Manual Rev. A on what valid values of maximum and optimal sizes are permitted, but while that document mentions a "Block Limits VPD Page", I couldn't actually find documentation of that page or what values it would have, or if a SCSI device has an advertisement of its minimal unmap granularity. So it is not obvious to me whether the Dell Equallogic device is compliance with the SCSI specification. Fortunately, it is easy enough to support non-power-of-2 sizing, even if it means we are less efficient than truly possible when targetting that device (for example, it means that we refuse to unmap anything that is not a multiple of 15M and aligned to a 15M boundary, even if the device truly does support a smaller granularity where unmapping actually works). Reported-by: Peter Lieven <pl@kamp.de> Signed-off-by: Eric Blake <eblake@redhat.com> Message-Id: <1469129688-22848-5-git-send-email-eblake@redhat.com> Acked-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Paolo Bonzini <pbonzini@redhat.com>
2016-07-22 03:34:48 +08:00
/* Maximum number of bytes that can zeroized at once (since it is
* signed, it must be < 2G, if set). Must be multiple of
* pwrite_zeroes_alignment. May be 0 if no inherent 32-bit limit */
int32_t max_pwrite_zeroes;
block: Cater to iscsi with non-power-of-2 discard Dell Equallogic iSCSI SANs have a very unusual advertised geometry: $ iscsi-inq -e 1 -c $((0xb0)) iscsi://XXX/0 wsnz:0 maximum compare and write length:1 optimal transfer length granularity:0 maximum transfer length:0 optimal transfer length:0 maximum prefetch xdread xdwrite transfer length:0 maximum unmap lba count:30720 maximum unmap block descriptor count:2 optimal unmap granularity:30720 ugavalid:1 unmap granularity alignment:0 maximum write same length:30720 which says that both the maximum and the optimal discard size is 15M. It is not immediately apparent if the device allows discard requests not aligned to the optimal size, nor if it allows discards at a finer granularity than the optimal size. I tried to find details in the SCSI Commands Reference Manual Rev. A on what valid values of maximum and optimal sizes are permitted, but while that document mentions a "Block Limits VPD Page", I couldn't actually find documentation of that page or what values it would have, or if a SCSI device has an advertisement of its minimal unmap granularity. So it is not obvious to me whether the Dell Equallogic device is compliance with the SCSI specification. Fortunately, it is easy enough to support non-power-of-2 sizing, even if it means we are less efficient than truly possible when targetting that device (for example, it means that we refuse to unmap anything that is not a multiple of 15M and aligned to a 15M boundary, even if the device truly does support a smaller granularity where unmapping actually works). Reported-by: Peter Lieven <pl@kamp.de> Signed-off-by: Eric Blake <eblake@redhat.com> Message-Id: <1469129688-22848-5-git-send-email-eblake@redhat.com> Acked-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Paolo Bonzini <pbonzini@redhat.com>
2016-07-22 03:34:48 +08:00
/* Optimal alignment for write zeroes requests in bytes. A power
* of 2 is best but not mandatory. Must be a multiple of
* bl.request_alignment, and must be less than max_pwrite_zeroes
* if that is set. May be 0 if bl.request_alignment is good
* enough */
uint32_t pwrite_zeroes_alignment;
block: Cater to iscsi with non-power-of-2 discard Dell Equallogic iSCSI SANs have a very unusual advertised geometry: $ iscsi-inq -e 1 -c $((0xb0)) iscsi://XXX/0 wsnz:0 maximum compare and write length:1 optimal transfer length granularity:0 maximum transfer length:0 optimal transfer length:0 maximum prefetch xdread xdwrite transfer length:0 maximum unmap lba count:30720 maximum unmap block descriptor count:2 optimal unmap granularity:30720 ugavalid:1 unmap granularity alignment:0 maximum write same length:30720 which says that both the maximum and the optimal discard size is 15M. It is not immediately apparent if the device allows discard requests not aligned to the optimal size, nor if it allows discards at a finer granularity than the optimal size. I tried to find details in the SCSI Commands Reference Manual Rev. A on what valid values of maximum and optimal sizes are permitted, but while that document mentions a "Block Limits VPD Page", I couldn't actually find documentation of that page or what values it would have, or if a SCSI device has an advertisement of its minimal unmap granularity. So it is not obvious to me whether the Dell Equallogic device is compliance with the SCSI specification. Fortunately, it is easy enough to support non-power-of-2 sizing, even if it means we are less efficient than truly possible when targetting that device (for example, it means that we refuse to unmap anything that is not a multiple of 15M and aligned to a 15M boundary, even if the device truly does support a smaller granularity where unmapping actually works). Reported-by: Peter Lieven <pl@kamp.de> Signed-off-by: Eric Blake <eblake@redhat.com> Message-Id: <1469129688-22848-5-git-send-email-eblake@redhat.com> Acked-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Paolo Bonzini <pbonzini@redhat.com>
2016-07-22 03:34:48 +08:00
/* Optimal transfer length in bytes. A power of 2 is best but not
* mandatory. Must be a multiple of bl.request_alignment, or 0 if
* no preferred size */
uint32_t opt_transfer;
block: Cater to iscsi with non-power-of-2 discard Dell Equallogic iSCSI SANs have a very unusual advertised geometry: $ iscsi-inq -e 1 -c $((0xb0)) iscsi://XXX/0 wsnz:0 maximum compare and write length:1 optimal transfer length granularity:0 maximum transfer length:0 optimal transfer length:0 maximum prefetch xdread xdwrite transfer length:0 maximum unmap lba count:30720 maximum unmap block descriptor count:2 optimal unmap granularity:30720 ugavalid:1 unmap granularity alignment:0 maximum write same length:30720 which says that both the maximum and the optimal discard size is 15M. It is not immediately apparent if the device allows discard requests not aligned to the optimal size, nor if it allows discards at a finer granularity than the optimal size. I tried to find details in the SCSI Commands Reference Manual Rev. A on what valid values of maximum and optimal sizes are permitted, but while that document mentions a "Block Limits VPD Page", I couldn't actually find documentation of that page or what values it would have, or if a SCSI device has an advertisement of its minimal unmap granularity. So it is not obvious to me whether the Dell Equallogic device is compliance with the SCSI specification. Fortunately, it is easy enough to support non-power-of-2 sizing, even if it means we are less efficient than truly possible when targetting that device (for example, it means that we refuse to unmap anything that is not a multiple of 15M and aligned to a 15M boundary, even if the device truly does support a smaller granularity where unmapping actually works). Reported-by: Peter Lieven <pl@kamp.de> Signed-off-by: Eric Blake <eblake@redhat.com> Message-Id: <1469129688-22848-5-git-send-email-eblake@redhat.com> Acked-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Paolo Bonzini <pbonzini@redhat.com>
2016-07-22 03:34:48 +08:00
/* Maximal transfer length in bytes. Need not be power of 2, but
* must be multiple of opt_transfer and bl.request_alignment, or 0
* for no 32-bit limit. For now, anything larger than INT_MAX is
* clamped down. */
uint32_t max_transfer;
/* memory alignment, in bytes so that no bounce buffer is needed */
size_t min_mem_alignment;
/* memory alignment, in bytes, for bounce buffer */
size_t opt_mem_alignment;
/* maximum number of iovec elements */
int max_iov;
} BlockLimits;
typedef struct BdrvOpBlocker BdrvOpBlocker;
typedef struct BdrvAioNotifier {
void (*attached_aio_context)(AioContext *new_context, void *opaque);
void (*detach_aio_context)(void *opaque);
void *opaque;
bool deleted;
QLIST_ENTRY(BdrvAioNotifier) list;
} BdrvAioNotifier;
struct BdrvChildRole {
/* If true, bdrv_replace_node() doesn't change the node this BdrvChild
* points to. */
bool stay_at_node;
/* If true, the parent is a BlockDriverState and bdrv_next_all_states()
* will return it. This information is used for drain_all, where every node
* will be drained separately, so the drain only needs to be propagated to
* non-BDS parents. */
bool parent_is_bds;
void (*inherit_options)(int *child_flags, QDict *child_options,
int parent_flags, QDict *parent_options);
void (*change_media)(BdrvChild *child, bool load);
void (*resize)(BdrvChild *child);
/* Returns a name that is supposedly more useful for human users than the
* node name for identifying the node in question (in particular, a BB
* name), or NULL if the parent can't provide a better name. */
const char *(*get_name)(BdrvChild *child);
/* Returns a malloced string that describes the parent of the child for a
* human reader. This could be a node-name, BlockBackend name, qdev ID or
* QOM path of the device owning the BlockBackend, job type and ID etc. The
* caller is responsible for freeing the memory. */
char *(*get_parent_desc)(BdrvChild *child);
/*
* If this pair of functions is implemented, the parent doesn't issue new
* requests after returning from .drained_begin() until .drained_end() is
* called.
*
* These functions must not change the graph (and therefore also must not
* call aio_poll(), which could change the graph indirectly).
*
block: Do not poll in bdrv_do_drained_end() We should never poll anywhere in bdrv_do_drained_end() (including its recursive callees like bdrv_drain_invoke()), because it does not cope well with graph changes. In fact, it has been written based on the postulation that no graph changes will happen in it. Instead, the callers that want to poll must poll, i.e. all currently globally available wrappers: bdrv_drained_end(), bdrv_subtree_drained_end(), bdrv_unapply_subtree_drain(), and bdrv_drain_all_end(). Graph changes there do not matter. They can poll simply by passing a pointer to a drained_end_counter and wait until it reaches 0. This patch also adds a non-polling global wrapper for bdrv_do_drained_end() that takes a drained_end_counter pointer. We need such a variant because now no function called anywhere from bdrv_do_drained_end() must poll. This includes BdrvChildRole.drained_end(), which already must not poll according to its interface documentation, but bdrv_child_cb_drained_end() just violates that by invoking bdrv_drained_end() (which does poll). Therefore, BdrvChildRole.drained_end() must take a *drained_end_counter parameter, which bdrv_child_cb_drained_end() can pass on to the new bdrv_drained_end_no_poll() function. Note that we now have a pattern of all drained_end-related functions either polling or receiving a *drained_end_counter to let the caller poll based on that. A problem with a single poll loop is that when the drained section in bdrv_set_aio_context_ignore() ends, some nodes in the subgraph may be in the old contexts, while others are in the new context already. To let the collective poll in bdrv_drained_end() work correctly, we must not hold a lock to the old context, so that the old context can make progress in case it is different from the current context. (In the process, remove the comment saying that the current context is always the old context, because it is wrong.) In all other places, all nodes in a subtree must be in the same context, so we can just poll that. The exception of course is bdrv_drain_all_end(), but that always runs in the main context, so we can just poll NULL (like bdrv_drain_all_begin() does). Signed-off-by: Max Reitz <mreitz@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2019-07-19 17:26:14 +08:00
* If drained_end() schedules background operations, it must atomically
* increment *drained_end_counter for each such operation and atomically
* decrement it once the operation has settled.
*
* Note that this can be nested. If drained_begin() was called twice, new
* I/O is allowed only after drained_end() was called twice, too.
*/
void (*drained_begin)(BdrvChild *child);
block: Do not poll in bdrv_do_drained_end() We should never poll anywhere in bdrv_do_drained_end() (including its recursive callees like bdrv_drain_invoke()), because it does not cope well with graph changes. In fact, it has been written based on the postulation that no graph changes will happen in it. Instead, the callers that want to poll must poll, i.e. all currently globally available wrappers: bdrv_drained_end(), bdrv_subtree_drained_end(), bdrv_unapply_subtree_drain(), and bdrv_drain_all_end(). Graph changes there do not matter. They can poll simply by passing a pointer to a drained_end_counter and wait until it reaches 0. This patch also adds a non-polling global wrapper for bdrv_do_drained_end() that takes a drained_end_counter pointer. We need such a variant because now no function called anywhere from bdrv_do_drained_end() must poll. This includes BdrvChildRole.drained_end(), which already must not poll according to its interface documentation, but bdrv_child_cb_drained_end() just violates that by invoking bdrv_drained_end() (which does poll). Therefore, BdrvChildRole.drained_end() must take a *drained_end_counter parameter, which bdrv_child_cb_drained_end() can pass on to the new bdrv_drained_end_no_poll() function. Note that we now have a pattern of all drained_end-related functions either polling or receiving a *drained_end_counter to let the caller poll based on that. A problem with a single poll loop is that when the drained section in bdrv_set_aio_context_ignore() ends, some nodes in the subgraph may be in the old contexts, while others are in the new context already. To let the collective poll in bdrv_drained_end() work correctly, we must not hold a lock to the old context, so that the old context can make progress in case it is different from the current context. (In the process, remove the comment saying that the current context is always the old context, because it is wrong.) In all other places, all nodes in a subtree must be in the same context, so we can just poll that. The exception of course is bdrv_drain_all_end(), but that always runs in the main context, so we can just poll NULL (like bdrv_drain_all_begin() does). Signed-off-by: Max Reitz <mreitz@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2019-07-19 17:26:14 +08:00
void (*drained_end)(BdrvChild *child, int *drained_end_counter);
/*
* Returns whether the parent has pending requests for the child. This
* callback is polled after .drained_begin() has been called until all
* activity on the child has stopped.
*/
bool (*drained_poll)(BdrvChild *child);
/* Notifies the parent that the child has been activated/inactivated (e.g.
* when migration is completing) and it can start/stop requesting
* permissions and doing I/O on it. */
void (*activate)(BdrvChild *child, Error **errp);
int (*inactivate)(BdrvChild *child);
void (*attach)(BdrvChild *child);
void (*detach)(BdrvChild *child);
/* Notifies the parent that the filename of its child has changed (e.g.
* because the direct child was removed from the backing chain), so that it
* can update its reference. */
int (*update_filename)(BdrvChild *child, BlockDriverState *new_base,
const char *filename, Error **errp);
bool (*can_set_aio_ctx)(BdrvChild *child, AioContext *ctx,
GSList **ignore, Error **errp);
void (*set_aio_ctx)(BdrvChild *child, AioContext *ctx, GSList **ignore);
};
extern const BdrvChildRole child_file;
extern const BdrvChildRole child_format;
extern const BdrvChildRole child_backing;
struct BdrvChild {
BlockDriverState *bs;
char *name;
const BdrvChildRole *role;
void *opaque;
/**
* Granted permissions for operating on this BdrvChild (BLK_PERM_* bitmask)
*/
uint64_t perm;
/**
* Permissions that can still be granted to other users of @bs while this
* BdrvChild is still attached to it. (BLK_PERM_* bitmask)
*/
uint64_t shared_perm;
/* backup of permissions during permission update procedure */
bool has_backup_perm;
uint64_t backup_perm;
uint64_t backup_shared_perm;
/*
* This link is frozen: the child can neither be replaced nor
* detached from the parent.
*/
bool frozen;
block: Introduce BdrvChild.parent_quiesce_counter Commit 5cb2737e925042e6c7cd3fb0b01313950b03cddf laid out why bdrv_do_drained_end() must decrement the quiesce_counter after bdrv_drain_invoke(). It did not give a very good reason why it has to happen after bdrv_parent_drained_end(), instead only claiming symmetry to bdrv_do_drained_begin(). It turns out that delaying it for so long is wrong. Situation: We have an active commit job (i.e. a mirror job) from top to base for the following graph: filter | [file] | v top --[backing]--> base Now the VM is closed, which results in the job being cancelled and a bdrv_drain_all() happening pretty much simultaneously. Beginning the drain means the job is paused once whenever one of its nodes is quiesced. This is reversed when the drain ends. With how the code currently is, after base's drain ends (which means that it will have unpaused the job once), its quiesce_counter remains at 1 while it goes to undrain its parents (bdrv_parent_drained_end()). For some reason or another, undraining filter causes the job to be kicked and enter mirror_exit_common(), where it proceeds to invoke block_job_remove_all_bdrv(). Now base will be detached from the job. Because its quiesce_counter is still 1, it will unpause the job once more. So in total, undraining base will unpause the job twice. Eventually, this will lead to the job's pause_count going negative -- well, it would, were there not an assertion against this, which crashes qemu. The general problem is that if in bdrv_parent_drained_end() we undrain parent A, and then undrain parent B, which then leads to A detaching the child, bdrv_replace_child_noperm() will undrain A as if we had not done so yet; that is, one time too many. It follows that we cannot decrement the quiesce_counter after invoking bdrv_parent_drained_end(). Unfortunately, decrementing it before bdrv_parent_drained_end() would be wrong, too. Imagine the above situation in reverse: Undraining A leads to B detaching the child. If we had already decremented the quiesce_counter by that point, bdrv_replace_child_noperm() would undrain B one time too little; because it expects bdrv_parent_drained_end() to issue this undrain. But bdrv_parent_drained_end() won't do that, because B is no longer a parent. Therefore, we have to do something else. This patch opts for introducing a second quiesce_counter that counts how many times a child's parent has been quiesced (though c->role->drained_*). With that, bdrv_replace_child_noperm() just has to undrain the parent exactly that many times when removing a child, and it will always be right. Signed-off-by: Max Reitz <mreitz@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2019-07-19 17:26:09 +08:00
/*
* How many times the parent of this child has been drained
* (through role->drained_*).
* Usually, this is equal to bs->quiesce_counter (potentially
* reduced by bdrv_drain_all_count). It may differ while the
* child is entering or leaving a drained section.
*/
int parent_quiesce_counter;
QLIST_ENTRY(BdrvChild) next;
QLIST_ENTRY(BdrvChild) next_parent;
};
/*
* Note: the function bdrv_append() copies and swaps contents of
* BlockDriverStates, so if you add new fields to this struct, please
* inspect bdrv_append() to determine if the new fields need to be
* copied as well.
*/
struct BlockDriverState {
/* Protected by big QEMU lock or read-only after opening. No special
* locking needed during I/O...
*/
int open_flags; /* flags used to open the file, re-used for re-open */
bool read_only; /* if true, the media is read only */
bool encrypted; /* if true, the media is encrypted */
bool sg; /* if true, the device is a /dev/sg* */
bool probed; /* if true, format was probed rather than specified */
bool force_share; /* if true, always allow all shared permissions */
block: Skip implicit nodes in query-block/blockstats Commits 0db832f and 6cdbceb introduced the automatic insertion of filter nodes above the top layer of mirror and commit block jobs. The assumption made there was that since libvirt doesn't do node-level management of the block layer yet, it shouldn't be affected by added nodes. This is true as far as commands issued by libvirt are concerned. It only uses BlockBackend names to address nodes, so any operations it performs still operate on the root of the tree as intended. However, the assumption breaks down when you consider query commands, which return data for the wrong node now. These commands also return information on some child nodes (bs->file and/or bs->backing), which libvirt does make use of, and which refer to the wrong nodes, too. One of the consequences is that oVirt gets wrong information about the image size and stops the VM in response as long as a mirror or commit job is running: https://bugzilla.redhat.com/show_bug.cgi?id=1470634 This patch fixes the problem by hiding the implicit nodes created automatically by the mirror and commit block jobs in the output of query-block and BlockBackend-based query-blockstats as long as the user doesn't indicate that they are aware of those nodes by providing a node name for them in the QMP command to start the block job. The node-based commands query-named-block-nodes and query-blockstats with query-nodes=true still show all nodes, including implicit ones. This ensures that users that are capable of node-level management can still access the full information; users that only know BlockBackends won't use these commands. Cc: qemu-stable@nongnu.org Signed-off-by: Kevin Wolf <kwolf@redhat.com> Reviewed-by: Peter Krempa <pkrempa@redhat.com> Reviewed-by: Max Reitz <mreitz@redhat.com> Tested-by: Eric Blake <eblake@redhat.com>
2017-07-18 23:24:05 +08:00
bool implicit; /* if true, this filter node was automatically inserted */
BlockDriver *drv; /* NULL means no media */
void *opaque;
AioContext *aio_context; /* event loop used for fd handlers, timers, etc */
/* long-running tasks intended to always use the same AioContext as this
* BDS may register themselves in this list to be notified of changes
* regarding this BDS's context */
QLIST_HEAD(, BdrvAioNotifier) aio_notifiers;
bool walking_aio_notifiers; /* to make removal during iteration safe */
char filename[PATH_MAX];
char backing_file[PATH_MAX]; /* if non zero, the image is a diff of
this file image */
block: Add BDS.auto_backing_file If the backing file is overridden, this most probably does change the guest-visible data of a BDS. Therefore, we will need to consider this in bdrv_refresh_filename(). To see whether it has been overridden, we might want to compare bs->backing_file and bs->backing->bs->filename. However, bs->backing_file is changed by bdrv_set_backing_hd() (which is just used to change the backing child at runtime, without modifying the image header), so bs->backing_file most of the time simply contains a copy of bs->backing->bs->filename anyway, so it is useless for such a comparison. This patch adds an auto_backing_file BDS field which contains the backing file path as indicated by the image header, which is not changed by bdrv_set_backing_hd(). Because of bdrv_refresh_filename() magic, however, a BDS's filename may differ from what has been specified during bdrv_open(). Then, the comparison between bs->auto_backing_file and bs->backing->bs->filename may fail even though bs->backing was opened from bs->auto_backing_file. To mitigate this, we can copy the real BDS's filename (after the whole bdrv_open() and bdrv_refresh_filename() process) into bs->auto_backing_file, if we know the former has been opened based on the latter. This is only possible if no options modifying the backing file's behavior have been specified, though. To simplify things, this patch only copies the filename from the backing file if no options have been specified for it at all. Furthermore, there are cases where an overlay is created by qemu which already contains a BDS's filename (e.g. in blockdev-snapshot-sync). We do not need to worry about updating the overlay's bs->auto_backing_file there, because we actually wrote a post-bdrv_refresh_filename() filename into the image header. So all in all, there will be false negatives where (as of a future patch) bdrv_refresh_filename() will assume that the backing file differs from what was specified in the image header, even though it really does not. However, these cases should be limited to where (1) the user actually did override something in the backing chain (e.g. by specifying options for the backing file), or (2) the user executed a QMP command to change some node's backing file (e.g. change-backing-file or block-commit with @backing-file given) where the given filename does not happen to coincide with qemu's idea of the backing BDS's filename. Then again, (1) really is limited to -drive. With -blockdev or blockdev-add, you have to adhere to the schema, so a user cannot give partial "unimportant" options (e.g. by just setting backing.node-name and leaving the rest to the image header). Therefore, trying to fix this would mean trying to fix something for -drive only. To improve on (2), we would need a full infrastructure to "canonicalize" an arbitrary filename (+ options), so it can be compared against another. That seems a bit over the top, considering that filenames nowadays are there mostly for the user's entertainment. Signed-off-by: Max Reitz <mreitz@redhat.com> Reviewed-by: Eric Blake <eblake@redhat.com> Reviewed-by: Alberto Garcia <berto@igalia.com> Message-id: 20190201192935.18394-5-mreitz@redhat.com Signed-off-by: Max Reitz <mreitz@redhat.com>
2019-02-02 03:29:08 +08:00
/* The backing filename indicated by the image header; if we ever
* open this file, then this is replaced by the resulting BDS's
* filename (i.e. after a bdrv_refresh_filename() run). */
char auto_backing_file[PATH_MAX];
char backing_format[16]; /* if non-zero and backing_file exists */
QDict *full_open_options;
char exact_filename[PATH_MAX];
BdrvChild *backing;
BdrvChild *file;
/* I/O Limits */
BlockLimits bl;
/* Flags honored during pwrite (so far: BDRV_REQ_FUA,
* BDRV_REQ_WRITE_UNCHANGED).
* If a driver does not support BDRV_REQ_WRITE_UNCHANGED, those
* writes will be issued as normal writes without the flag set.
* This is important to note for drivers that do not explicitly
* request a WRITE permission for their children and instead take
* the same permissions as their parent did (this is commonly what
* block filters do). Such drivers have to be aware that the
* parent may have taken a WRITE_UNCHANGED permission only and is
* issuing such requests. Drivers either must make sure that
* these requests do not result in plain WRITE accesses (usually
* by supporting BDRV_REQ_WRITE_UNCHANGED, and then forwarding
* every incoming write request as-is, including potentially that
* flag), or they have to explicitly take the WRITE permission for
* their children. */
unsigned int supported_write_flags;
/* Flags honored during pwrite_zeroes (so far: BDRV_REQ_FUA,
* BDRV_REQ_MAY_UNMAP, BDRV_REQ_WRITE_UNCHANGED) */
block: Honor BDRV_REQ_FUA during write_zeroes The block layer has a couple of cases where it can lose Force Unit Access semantics when writing a large block of zeroes, such that the request returns before the zeroes have been guaranteed to land on underlying media. SCSI does not support FUA during WRITESAME(10/16); FUA is only supported if it falls back to WRITE(10/16). But where the underlying device is new enough to not need a fallback, it means that any upper layer request with FUA semantics was silently ignoring BDRV_REQ_FUA. Conversely, NBD has situations where it can support FUA but not ZERO_WRITE; when that happens, the generic block layer fallback to bdrv_driver_pwritev() (or the older bdrv_co_writev() in qemu 2.6) was losing the FUA flag. The problem of losing flags unrelated to ZERO_WRITE has been latent in bdrv_co_do_write_zeroes() since commit aa7bfbff, but back then, it did not matter because there was no FUA flag. It became observable when commit 93f5e6d8 paved the way for flags that can impact correctness, when we should have been using bdrv_co_writev_flags() with modified flags. Compare to commit 9eeb6dd, which got flag manipulation right in bdrv_co_do_zero_pwritev(). Symptoms: I tested with qemu-io with default writethrough cache (which is supposed to use FUA semantics on every write), and targetted an NBD client connected to a server that intentionally did not advertise NBD_FLAG_SEND_FUA. When doing 'write 0 512', the NBD client sent two operations (NBD_CMD_WRITE then NBD_CMD_FLUSH) to get the fallback FUA semantics; but when doing 'write -z 0 512', the NBD client sent only NBD_CMD_WRITE. The fix is do to a cleanup bdrv_co_flush() at the end of the operation if any step in the middle relied on a BDS that does not natively support FUA for that step (note that we don't need to flush after every operation, if the operation is broken into chunks based on bounce-buffer sizing). Each BDS gains a new flag .supported_zero_flags, which parallels the use of .supported_write_flags but only when accessing a zero write operation (the flags MUST be different, because of SCSI having different semantics based on WRITE vs. WRITESAME; and also because BDRV_REQ_MAY_UNMAP only makes sense on zero writes). Also fix some documentation to describe -ENOTSUP semantics, particularly since iscsi depends on those semantics. Down the road, we may want to add a driver where its .bdrv_co_pwritev() honors all three of BDRV_REQ_FUA, BDRV_REQ_ZERO_WRITE, and BDRV_REQ_MAY_UNMAP, and advertise this via bs->supported_write_flags for blocks opened by that driver; such a driver should NOT supply .bdrv_co_write_zeroes nor .supported_zero_flags. But none of the drivers touched in this patch want to do that (the act of writing zeroes is different enough from normal writes to deserve a second callback). Signed-off-by: Eric Blake <eblake@redhat.com> Reviewed-by: Fam Zheng <famz@redhat.com> Acked-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2016-05-04 06:39:07 +08:00
unsigned int supported_zero_flags;
/* the following member gives a name to every node on the bs graph. */
char node_name[32];
/* element of the list of named nodes building the graph */
QTAILQ_ENTRY(BlockDriverState) node_list;
/* element of the list of all BlockDriverStates (all_bdrv_states) */
QTAILQ_ENTRY(BlockDriverState) bs_list;
/* element of the list of monitor-owned BDS */
QTAILQ_ENTRY(BlockDriverState) monitor_list;
int refcnt;
/* operation blockers */
QLIST_HEAD(, BdrvOpBlocker) op_blockers[BLOCK_OP_TYPE_MAX];
/* The node that this node inherited default options from (and a reopen on
* which can affect this node by changing these defaults). This is always a
* parent node of this node. */
BlockDriverState *inherits_from;
QLIST_HEAD(, BdrvChild) children;
QLIST_HEAD(, BdrvChild) parents;
QDict *options;
QDict *explicit_options;
BlockdevDetectZeroesOptions detect_zeroes;
/* The error object in use for blocking operations on backing_hd */
Error *backing_blocker;
block: add event when disk usage exceeds threshold Managing applications, like oVirt (http://www.ovirt.org), make extensive use of thin-provisioned disk images. To let the guest run smoothly and be not unnecessarily paused, oVirt sets a disk usage threshold (so called 'high water mark') based on the occupation of the device, and automatically extends the image once the threshold is reached or exceeded. In order to detect the crossing of the threshold, oVirt has no choice but aggressively polling the QEMU monitor using the query-blockstats command. This lead to unnecessary system load, and is made even worse under scale: deployments with hundreds of VMs are no longer rare. To fix this, this patch adds: * A new monitor command `block-set-write-threshold', to set a mark for a given block device. * A new event `BLOCK_WRITE_THRESHOLD', to report if a block device usage exceeds the threshold. * A new `write_threshold' field into the `BlockDeviceInfo' structure, to report the configured threshold. This will allow the managing application to use smarter and more efficient monitoring, greatly reducing the need of polling. [Updated qemu-iotests 067 output to add the new 'write_threshold' property. --Stefan] [Changed g_assert_false() to !g_assert() to fix the build on older glib versions. --Kevin] Signed-off-by: Francesco Romani <fromani@redhat.com> Reviewed-by: Eric Blake <eblake@redhat.com> Message-id: 1421068273-692-1-git-send-email-fromani@redhat.com Signed-off-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2015-01-12 21:11:13 +08:00
/* Protected by AioContext lock */
/* If we are reading a disk image, give its size in sectors.
* Generally read-only; it is written to by load_snapshot and
* save_snaphost, but the block layer is quiescent during those.
*/
int64_t total_sectors;
/* Callback before write request is processed */
NotifierWithReturnList before_write_notifiers;
block: add event when disk usage exceeds threshold Managing applications, like oVirt (http://www.ovirt.org), make extensive use of thin-provisioned disk images. To let the guest run smoothly and be not unnecessarily paused, oVirt sets a disk usage threshold (so called 'high water mark') based on the occupation of the device, and automatically extends the image once the threshold is reached or exceeded. In order to detect the crossing of the threshold, oVirt has no choice but aggressively polling the QEMU monitor using the query-blockstats command. This lead to unnecessary system load, and is made even worse under scale: deployments with hundreds of VMs are no longer rare. To fix this, this patch adds: * A new monitor command `block-set-write-threshold', to set a mark for a given block device. * A new event `BLOCK_WRITE_THRESHOLD', to report if a block device usage exceeds the threshold. * A new `write_threshold' field into the `BlockDeviceInfo' structure, to report the configured threshold. This will allow the managing application to use smarter and more efficient monitoring, greatly reducing the need of polling. [Updated qemu-iotests 067 output to add the new 'write_threshold' property. --Stefan] [Changed g_assert_false() to !g_assert() to fix the build on older glib versions. --Kevin] Signed-off-by: Francesco Romani <fromani@redhat.com> Reviewed-by: Eric Blake <eblake@redhat.com> Message-id: 1421068273-692-1-git-send-email-fromani@redhat.com Signed-off-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2015-01-12 21:11:13 +08:00
/* threshold limit for writes, in bytes. "High water mark". */
uint64_t write_threshold_offset;
NotifierWithReturn write_threshold_notifier;
/* Writing to the list requires the BQL _and_ the dirty_bitmap_mutex.
* Reading from the list can be done with either the BQL or the
* dirty_bitmap_mutex. Modifying a bitmap only requires
* dirty_bitmap_mutex. */
QemuMutex dirty_bitmap_mutex;
QLIST_HEAD(, BdrvDirtyBitmap) dirty_bitmaps;
/* Offset after the highest byte written to */
Stat64 wr_highest_offset;
/* If true, copy read backing sectors into image. Can be >1 if more
* than one client has requested copy-on-read. Accessed with atomic
* ops.
*/
int copy_on_read;
/* number of in-flight requests; overall and serialising.
* Accessed with atomic ops.
*/
unsigned int in_flight;
unsigned int serialising_in_flight;
/* counter for nested bdrv_io_plug.
* Accessed with atomic ops.
*/
unsigned io_plugged;
/* do we need to tell the quest if we have a volatile write cache? */
int enable_write_cache;
/* Accessed with atomic ops. */
int quiesce_counter;
int recursive_quiesce_counter;
unsigned int write_gen; /* Current data generation */
/* Protected by reqs_lock. */
CoMutex reqs_lock;
QLIST_HEAD(, BdrvTrackedRequest) tracked_requests;
CoQueue flush_queue; /* Serializing flush queue */
bool active_flush_req; /* Flush request in flight? */
/* Only read/written by whoever has set active_flush_req to true. */
unsigned int flushed_gen; /* Flushed write generation */
/* BdrvChild links to this node may never be frozen */
bool never_freeze;
};
struct BlockBackendRootState {
int open_flags;
bool read_only;
BlockdevDetectZeroesOptions detect_zeroes;
};
block/mirror: Fix target backing BDS Currently, we are trying to move the backing BDS from the source to the target in bdrv_replace_in_backing_chain() which is called from mirror_exit(). However, mirror_complete() already tries to open the target's backing chain with a call to bdrv_open_backing_file(). First, we should only set the target's backing BDS once. Second, the mirroring block job has a better idea of what to set it to than the generic code in bdrv_replace_in_backing_chain() (in fact, the latter's conditions on when to move the backing BDS from source to target are not really correct). Therefore, remove that code from bdrv_replace_in_backing_chain() and leave it to mirror_complete(). Depending on what kind of mirroring is performed, we furthermore want to use different strategies to open the target's backing chain: - If blockdev-mirror is used, we can assume the user made sure that the target already has the correct backing chain. In particular, we should not try to open a backing file if the target does not have any yet. - If drive-mirror with mode=absolute-paths is used, we can and should reuse the already existing chain of nodes that the source BDS is in. In case of sync=full, no backing BDS is required; with sync=top, we just link the source's backing BDS to the target, and with sync=none, we use the source BDS as the target's backing BDS. We should not try to open these backing files anew because this would lead to two BDSs existing per physical file in the backing chain, and we would like to avoid such concurrent access. - If drive-mirror with mode=existing is used, we have to use the information provided in the physical image file which means opening the target's backing chain completely anew, just as it has been done already. If the target's backing chain shares images with the source, this may lead to multiple BDSs per physical image file. But since we cannot reliably ascertain this case, there is nothing we can do about it. Signed-off-by: Max Reitz <mreitz@redhat.com> Message-id: 20160610185750.30956-3-mreitz@redhat.com Reviewed-by: Kevin Wolf <kwolf@redhat.com> Reviewed-by: Fam Zheng <famz@redhat.com> Signed-off-by: Max Reitz <mreitz@redhat.com>
2016-06-11 02:57:47 +08:00
typedef enum BlockMirrorBackingMode {
/* Reuse the existing backing chain from the source for the target.
* - sync=full: Set backing BDS to NULL.
* - sync=top: Use source's backing BDS.
* - sync=none: Use source as the backing BDS. */
MIRROR_SOURCE_BACKING_CHAIN,
/* Open the target's backing chain completely anew */
MIRROR_OPEN_BACKING_CHAIN,
/* Do not change the target's backing BDS after job completion */
MIRROR_LEAVE_BACKING_CHAIN,
} BlockMirrorBackingMode;
static inline BlockDriverState *backing_bs(BlockDriverState *bs)
{
return bs->backing ? bs->backing->bs : NULL;
}
/* Essential block drivers which must always be statically linked into qemu, and
* which therefore can be accessed without using bdrv_find_format() */
extern BlockDriver bdrv_file;
extern BlockDriver bdrv_raw;
extern BlockDriver bdrv_qcow2;
int coroutine_fn bdrv_co_preadv(BdrvChild *child,
int64_t offset, unsigned int bytes, QEMUIOVector *qiov,
BdrvRequestFlags flags);
int coroutine_fn bdrv_co_preadv_part(BdrvChild *child,
int64_t offset, unsigned int bytes,
QEMUIOVector *qiov, size_t qiov_offset, BdrvRequestFlags flags);
int coroutine_fn bdrv_co_pwritev(BdrvChild *child,
int64_t offset, unsigned int bytes, QEMUIOVector *qiov,
BdrvRequestFlags flags);
int coroutine_fn bdrv_co_pwritev_part(BdrvChild *child,
int64_t offset, unsigned int bytes,
QEMUIOVector *qiov, size_t qiov_offset, BdrvRequestFlags flags);
static inline int coroutine_fn bdrv_co_pread(BdrvChild *child,
int64_t offset, unsigned int bytes, void *buf, BdrvRequestFlags flags)
{
QEMUIOVector qiov = QEMU_IOVEC_INIT_BUF(qiov, buf, bytes);
return bdrv_co_preadv(child, offset, bytes, &qiov, flags);
}
static inline int coroutine_fn bdrv_co_pwrite(BdrvChild *child,
int64_t offset, unsigned int bytes, void *buf, BdrvRequestFlags flags)
{
QEMUIOVector qiov = QEMU_IOVEC_INIT_BUF(qiov, buf, bytes);
return bdrv_co_pwritev(child, offset, bytes, &qiov, flags);
}
extern unsigned int bdrv_drain_all_count;
void bdrv_apply_subtree_drain(BdrvChild *child, BlockDriverState *new_parent);
void bdrv_unapply_subtree_drain(BdrvChild *child, BlockDriverState *old_parent);
bool coroutine_fn bdrv_wait_serialising_requests(BdrvTrackedRequest *self);
void bdrv_mark_request_serialising(BdrvTrackedRequest *req, uint64_t align);
BdrvTrackedRequest *coroutine_fn bdrv_co_get_self_request(BlockDriverState *bs);
int get_tmp_filename(char *filename, int size);
raw: Prohibit dangerous writes for probed images If the user neglects to specify the image format, QEMU probes the image to guess it automatically, for convenience. Relying on format probing is insecure for raw images (CVE-2008-2004). If the guest writes a suitable header to the device, the next probe will recognize a format chosen by the guest. A malicious guest can abuse this to gain access to host files, e.g. by crafting a QCOW2 header with backing file /etc/shadow. Commit 1e72d3b (April 2008) provided -drive parameter format to let users disable probing. Commit f965509 (March 2009) extended QCOW2 to optionally store the backing file format, to let users disable backing file probing. QED has had a flag to suppress probing since the beginning (2010), set whenever a raw backing file is assigned. All of these additions that allow to avoid format probing have to be specified explicitly. The default still allows the attack. In order to fix this, commit 79368c8 (July 2010) put probed raw images in a restricted mode, in which they wouldn't be able to overwrite the first few bytes of the image so that they would identify as a different image. If a write to the first sector would write one of the signatures of another driver, qemu would instead zero out the first four bytes. This patch was later reverted in commit 8b33d9e (September 2010) because it didn't get the handling of unaligned qiov members right. Today's block layer that is based on coroutines and has qiov utility functions makes it much easier to get this functionality right, so this patch implements it. The other differences of this patch to the old one are that it doesn't silently write something different than the guest requested by zeroing out some bytes (it fails the request instead) and that it doesn't maintain a list of signatures in the raw driver (it calls the usual probe function instead). Note that this change doesn't introduce new breakage for false positive cases where the guest legitimately writes data into the first sector that matches the signatures of an image format (e.g. for nested virt): These cases were broken before, only the failure mode changes from corruption after the next restart (when the wrong format is probed) to failing the problematic write request. Also note that like in the original patch, the restrictions only apply if the image format has been guessed by probing. Explicitly specifying a format allows guests to write anything they like. Signed-off-by: Kevin Wolf <kwolf@redhat.com> Reviewed-by: Eric Blake <eblake@redhat.com> Reviewed-by: Max Reitz <mreitz@redhat.com> Reviewed-by: Stefan Hajnoczi <stefanha@redhat.com> Message-id: 1416497234-29880-8-git-send-email-kwolf@redhat.com Signed-off-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2014-11-20 23:27:12 +08:00
BlockDriver *bdrv_probe_all(const uint8_t *buf, int buf_size,
const char *filename);
2017-05-23 03:52:16 +08:00
void bdrv_parse_filename_strip_prefix(const char *filename, const char *prefix,
QDict *options);
/**
* bdrv_add_before_write_notifier:
*
* Register a callback that is invoked before write requests are processed but
* after any throttling or waiting for overlapping requests.
*/
void bdrv_add_before_write_notifier(BlockDriverState *bs,
NotifierWithReturn *notifier);
/**
* bdrv_add_aio_context_notifier:
*
* If a long-running job intends to be always run in the same AioContext as a
* certain BDS, it may use this function to be notified of changes regarding the
* association of the BDS to an AioContext.
*
* attached_aio_context() is called after the target BDS has been attached to a
* new AioContext; detach_aio_context() is called before the target BDS is being
* detached from its old AioContext.
*/
void bdrv_add_aio_context_notifier(BlockDriverState *bs,
void (*attached_aio_context)(AioContext *new_context, void *opaque),
void (*detach_aio_context)(void *opaque), void *opaque);
/**
* bdrv_remove_aio_context_notifier:
*
* Unsubscribe of change notifications regarding the BDS's AioContext. The
* parameters given here have to be the same as those given to
* bdrv_add_aio_context_notifier().
*/
void bdrv_remove_aio_context_notifier(BlockDriverState *bs,
void (*aio_context_attached)(AioContext *,
void *),
void (*aio_context_detached)(void *),
void *opaque);
/**
* bdrv_wakeup:
* @bs: The BlockDriverState for which an I/O operation has been completed.
*
* Wake up the main thread if it is waiting on BDRV_POLL_WHILE. During
* synchronous I/O on a BlockDriverState that is attached to another
* I/O thread, the main thread lets the I/O thread's event loop run,
* waiting for the I/O operation to complete. A bdrv_wakeup will wake
* up the main thread if necessary.
*
* Manual calls to bdrv_wakeup are rarely necessary, because
* bdrv_dec_in_flight already calls it.
*/
void bdrv_wakeup(BlockDriverState *bs);
#ifdef _WIN32
int is_windows_drive(const char *filename);
#endif
/**
* stream_start:
* @job_id: The id of the newly-created job, or %NULL to use the
* device name of @bs.
* @bs: Block device to operate on.
* @base: Block device that will become the new base, or %NULL to
* flatten the whole backing file chain onto @bs.
* @backing_file_str: The file name that will be written to @bs as the
* the new backing file if the job completes. Ignored if @base is %NULL.
* @creation_flags: Flags that control the behavior of the Job lifetime.
* See @BlockJobCreateFlags
* @speed: The maximum speed, in bytes per second, or 0 for unlimited.
* @on_error: The action to take upon error.
* @errp: Error object.
*
* Start a streaming operation on @bs. Clusters that are unallocated
* in @bs, but allocated in any image between @base and @bs (both
* exclusive) will be written to @bs. At the end of a successful
* streaming job, the backing file of @bs will be changed to
* @backing_file_str in the written image and to @base in the live
* BlockDriverState.
*/
void stream_start(const char *job_id, BlockDriverState *bs,
BlockDriverState *base, const char *backing_file_str,
int creation_flags, int64_t speed,
BlockdevOnError on_error, Error **errp);
/**
* commit_start:
* @job_id: The id of the newly-created job, or %NULL to use the
* device name of @bs.
* @bs: Active block device.
* @top: Top block device to be committed.
* @base: Block device that will be written into, and become the new top.
* @creation_flags: Flags that control the behavior of the Job lifetime.
* See @BlockJobCreateFlags
* @speed: The maximum speed, in bytes per second, or 0 for unlimited.
* @on_error: The action to take upon error.
* @backing_file_str: String to use as the backing file in @top's overlay
* @filter_node_name: The node name that should be assigned to the filter
* driver that the commit job inserts into the graph above @top. NULL means
* that a node name should be autogenerated.
* @errp: Error object.
*
*/
void commit_start(const char *job_id, BlockDriverState *bs,
BlockDriverState *base, BlockDriverState *top,
int creation_flags, int64_t speed,
BlockdevOnError on_error, const char *backing_file_str,
const char *filter_node_name, Error **errp);
/**
* commit_active_start:
* @job_id: The id of the newly-created job, or %NULL to use the
* device name of @bs.
* @bs: Active block device to be committed.
* @base: Block device that will be written into, and become the new top.
* @creation_flags: Flags that control the behavior of the Job lifetime.
* See @BlockJobCreateFlags
* @speed: The maximum speed, in bytes per second, or 0 for unlimited.
* @on_error: The action to take upon error.
* @filter_node_name: The node name that should be assigned to the filter
* driver that the commit job inserts into the graph above @bs. NULL means that
* a node name should be autogenerated.
* @cb: Completion function for the job.
* @opaque: Opaque pointer value passed to @cb.
* @auto_complete: Auto complete the job.
* @errp: Error object.
*
*/
BlockJob *commit_active_start(const char *job_id, BlockDriverState *bs,
BlockDriverState *base, int creation_flags,
int64_t speed, BlockdevOnError on_error,
const char *filter_node_name,
BlockCompletionFunc *cb, void *opaque,
bool auto_complete, Error **errp);
mirror: introduce mirror job This patch adds the implementation of a new job that mirrors a disk to a new image while letting the guest continue using the old image. The target is treated as a "black box" and data is copied from the source to the target in the background. This can be used for several purposes, including storage migration, continuous replication, and observation of the guest I/O in an external program. It is also a first step in replacing the inefficient block migration code that is part of QEMU. The job is possibly never-ending, but it is logically structured into two phases: 1) copy all data as fast as possible until the target first gets in sync with the source; 2) keep target in sync and ensure that reopening to the target gets a correct (full) copy of the source data. The second phase is indicated by the progress in "info block-jobs" reporting the current offset to be equal to the length of the file. When the job is cancelled in the second phase, QEMU will run the job until the source is clean and quiescent, then it will report successful completion of the job. In other words, the BLOCK_JOB_CANCELLED event means that the target may _not_ be consistent with a past state of the source; the BLOCK_JOB_COMPLETED event means that the target is consistent with a past state of the source. (Note that it could already happen that management lost the race against QEMU and got a completion event instead of cancellation). It is not yet possible to complete the job and switch over to the target disk. The next patches will fix this and add many refinements to the basic idea introduced here. These include improved error management, some tunable knobs and performance optimizations. Signed-off-by: Paolo Bonzini <pbonzini@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2012-10-18 22:49:23 +08:00
/*
* mirror_start:
* @job_id: The id of the newly-created job, or %NULL to use the
* device name of @bs.
mirror: introduce mirror job This patch adds the implementation of a new job that mirrors a disk to a new image while letting the guest continue using the old image. The target is treated as a "black box" and data is copied from the source to the target in the background. This can be used for several purposes, including storage migration, continuous replication, and observation of the guest I/O in an external program. It is also a first step in replacing the inefficient block migration code that is part of QEMU. The job is possibly never-ending, but it is logically structured into two phases: 1) copy all data as fast as possible until the target first gets in sync with the source; 2) keep target in sync and ensure that reopening to the target gets a correct (full) copy of the source data. The second phase is indicated by the progress in "info block-jobs" reporting the current offset to be equal to the length of the file. When the job is cancelled in the second phase, QEMU will run the job until the source is clean and quiescent, then it will report successful completion of the job. In other words, the BLOCK_JOB_CANCELLED event means that the target may _not_ be consistent with a past state of the source; the BLOCK_JOB_COMPLETED event means that the target is consistent with a past state of the source. (Note that it could already happen that management lost the race against QEMU and got a completion event instead of cancellation). It is not yet possible to complete the job and switch over to the target disk. The next patches will fix this and add many refinements to the basic idea introduced here. These include improved error management, some tunable knobs and performance optimizations. Signed-off-by: Paolo Bonzini <pbonzini@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2012-10-18 22:49:23 +08:00
* @bs: Block device to operate on.
* @target: Block device to write to.
* @replaces: Block graph node name to replace once the mirror is done. Can
* only be used when full mirroring is selected.
* @creation_flags: Flags that control the behavior of the Job lifetime.
* See @BlockJobCreateFlags
mirror: introduce mirror job This patch adds the implementation of a new job that mirrors a disk to a new image while letting the guest continue using the old image. The target is treated as a "black box" and data is copied from the source to the target in the background. This can be used for several purposes, including storage migration, continuous replication, and observation of the guest I/O in an external program. It is also a first step in replacing the inefficient block migration code that is part of QEMU. The job is possibly never-ending, but it is logically structured into two phases: 1) copy all data as fast as possible until the target first gets in sync with the source; 2) keep target in sync and ensure that reopening to the target gets a correct (full) copy of the source data. The second phase is indicated by the progress in "info block-jobs" reporting the current offset to be equal to the length of the file. When the job is cancelled in the second phase, QEMU will run the job until the source is clean and quiescent, then it will report successful completion of the job. In other words, the BLOCK_JOB_CANCELLED event means that the target may _not_ be consistent with a past state of the source; the BLOCK_JOB_COMPLETED event means that the target is consistent with a past state of the source. (Note that it could already happen that management lost the race against QEMU and got a completion event instead of cancellation). It is not yet possible to complete the job and switch over to the target disk. The next patches will fix this and add many refinements to the basic idea introduced here. These include improved error management, some tunable knobs and performance optimizations. Signed-off-by: Paolo Bonzini <pbonzini@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2012-10-18 22:49:23 +08:00
* @speed: The maximum speed, in bytes per second, or 0 for unlimited.
* @granularity: The chosen granularity for the dirty bitmap.
* @buf_size: The amount of data that can be in flight at one time.
mirror: introduce mirror job This patch adds the implementation of a new job that mirrors a disk to a new image while letting the guest continue using the old image. The target is treated as a "black box" and data is copied from the source to the target in the background. This can be used for several purposes, including storage migration, continuous replication, and observation of the guest I/O in an external program. It is also a first step in replacing the inefficient block migration code that is part of QEMU. The job is possibly never-ending, but it is logically structured into two phases: 1) copy all data as fast as possible until the target first gets in sync with the source; 2) keep target in sync and ensure that reopening to the target gets a correct (full) copy of the source data. The second phase is indicated by the progress in "info block-jobs" reporting the current offset to be equal to the length of the file. When the job is cancelled in the second phase, QEMU will run the job until the source is clean and quiescent, then it will report successful completion of the job. In other words, the BLOCK_JOB_CANCELLED event means that the target may _not_ be consistent with a past state of the source; the BLOCK_JOB_COMPLETED event means that the target is consistent with a past state of the source. (Note that it could already happen that management lost the race against QEMU and got a completion event instead of cancellation). It is not yet possible to complete the job and switch over to the target disk. The next patches will fix this and add many refinements to the basic idea introduced here. These include improved error management, some tunable knobs and performance optimizations. Signed-off-by: Paolo Bonzini <pbonzini@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2012-10-18 22:49:23 +08:00
* @mode: Whether to collapse all images in the chain to the target.
block/mirror: Fix target backing BDS Currently, we are trying to move the backing BDS from the source to the target in bdrv_replace_in_backing_chain() which is called from mirror_exit(). However, mirror_complete() already tries to open the target's backing chain with a call to bdrv_open_backing_file(). First, we should only set the target's backing BDS once. Second, the mirroring block job has a better idea of what to set it to than the generic code in bdrv_replace_in_backing_chain() (in fact, the latter's conditions on when to move the backing BDS from source to target are not really correct). Therefore, remove that code from bdrv_replace_in_backing_chain() and leave it to mirror_complete(). Depending on what kind of mirroring is performed, we furthermore want to use different strategies to open the target's backing chain: - If blockdev-mirror is used, we can assume the user made sure that the target already has the correct backing chain. In particular, we should not try to open a backing file if the target does not have any yet. - If drive-mirror with mode=absolute-paths is used, we can and should reuse the already existing chain of nodes that the source BDS is in. In case of sync=full, no backing BDS is required; with sync=top, we just link the source's backing BDS to the target, and with sync=none, we use the source BDS as the target's backing BDS. We should not try to open these backing files anew because this would lead to two BDSs existing per physical file in the backing chain, and we would like to avoid such concurrent access. - If drive-mirror with mode=existing is used, we have to use the information provided in the physical image file which means opening the target's backing chain completely anew, just as it has been done already. If the target's backing chain shares images with the source, this may lead to multiple BDSs per physical image file. But since we cannot reliably ascertain this case, there is nothing we can do about it. Signed-off-by: Max Reitz <mreitz@redhat.com> Message-id: 20160610185750.30956-3-mreitz@redhat.com Reviewed-by: Kevin Wolf <kwolf@redhat.com> Reviewed-by: Fam Zheng <famz@redhat.com> Signed-off-by: Max Reitz <mreitz@redhat.com>
2016-06-11 02:57:47 +08:00
* @backing_mode: How to establish the target's backing chain after completion.
* @zero_target: Whether the target should be explicitly zero-initialized
* @on_source_error: The action to take upon error reading from the source.
* @on_target_error: The action to take upon error writing to the target.
* @unmap: Whether to unmap target where source sectors only contain zeroes.
* @filter_node_name: The node name that should be assigned to the filter
* driver that the mirror job inserts into the graph above @bs. NULL means that
* a node name should be autogenerated.
* @copy_mode: When to trigger writes to the target.
mirror: introduce mirror job This patch adds the implementation of a new job that mirrors a disk to a new image while letting the guest continue using the old image. The target is treated as a "black box" and data is copied from the source to the target in the background. This can be used for several purposes, including storage migration, continuous replication, and observation of the guest I/O in an external program. It is also a first step in replacing the inefficient block migration code that is part of QEMU. The job is possibly never-ending, but it is logically structured into two phases: 1) copy all data as fast as possible until the target first gets in sync with the source; 2) keep target in sync and ensure that reopening to the target gets a correct (full) copy of the source data. The second phase is indicated by the progress in "info block-jobs" reporting the current offset to be equal to the length of the file. When the job is cancelled in the second phase, QEMU will run the job until the source is clean and quiescent, then it will report successful completion of the job. In other words, the BLOCK_JOB_CANCELLED event means that the target may _not_ be consistent with a past state of the source; the BLOCK_JOB_COMPLETED event means that the target is consistent with a past state of the source. (Note that it could already happen that management lost the race against QEMU and got a completion event instead of cancellation). It is not yet possible to complete the job and switch over to the target disk. The next patches will fix this and add many refinements to the basic idea introduced here. These include improved error management, some tunable knobs and performance optimizations. Signed-off-by: Paolo Bonzini <pbonzini@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2012-10-18 22:49:23 +08:00
* @errp: Error object.
*
* Start a mirroring operation on @bs. Clusters that are allocated
* in @bs will be written to @target until the job is cancelled or
mirror: introduce mirror job This patch adds the implementation of a new job that mirrors a disk to a new image while letting the guest continue using the old image. The target is treated as a "black box" and data is copied from the source to the target in the background. This can be used for several purposes, including storage migration, continuous replication, and observation of the guest I/O in an external program. It is also a first step in replacing the inefficient block migration code that is part of QEMU. The job is possibly never-ending, but it is logically structured into two phases: 1) copy all data as fast as possible until the target first gets in sync with the source; 2) keep target in sync and ensure that reopening to the target gets a correct (full) copy of the source data. The second phase is indicated by the progress in "info block-jobs" reporting the current offset to be equal to the length of the file. When the job is cancelled in the second phase, QEMU will run the job until the source is clean and quiescent, then it will report successful completion of the job. In other words, the BLOCK_JOB_CANCELLED event means that the target may _not_ be consistent with a past state of the source; the BLOCK_JOB_COMPLETED event means that the target is consistent with a past state of the source. (Note that it could already happen that management lost the race against QEMU and got a completion event instead of cancellation). It is not yet possible to complete the job and switch over to the target disk. The next patches will fix this and add many refinements to the basic idea introduced here. These include improved error management, some tunable knobs and performance optimizations. Signed-off-by: Paolo Bonzini <pbonzini@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2012-10-18 22:49:23 +08:00
* manually completed. At the end of a successful mirroring job,
* @bs will be switched to read from @target.
*/
void mirror_start(const char *job_id, BlockDriverState *bs,
BlockDriverState *target, const char *replaces,
int creation_flags, int64_t speed,
uint32_t granularity, int64_t buf_size,
block/mirror: Fix target backing BDS Currently, we are trying to move the backing BDS from the source to the target in bdrv_replace_in_backing_chain() which is called from mirror_exit(). However, mirror_complete() already tries to open the target's backing chain with a call to bdrv_open_backing_file(). First, we should only set the target's backing BDS once. Second, the mirroring block job has a better idea of what to set it to than the generic code in bdrv_replace_in_backing_chain() (in fact, the latter's conditions on when to move the backing BDS from source to target are not really correct). Therefore, remove that code from bdrv_replace_in_backing_chain() and leave it to mirror_complete(). Depending on what kind of mirroring is performed, we furthermore want to use different strategies to open the target's backing chain: - If blockdev-mirror is used, we can assume the user made sure that the target already has the correct backing chain. In particular, we should not try to open a backing file if the target does not have any yet. - If drive-mirror with mode=absolute-paths is used, we can and should reuse the already existing chain of nodes that the source BDS is in. In case of sync=full, no backing BDS is required; with sync=top, we just link the source's backing BDS to the target, and with sync=none, we use the source BDS as the target's backing BDS. We should not try to open these backing files anew because this would lead to two BDSs existing per physical file in the backing chain, and we would like to avoid such concurrent access. - If drive-mirror with mode=existing is used, we have to use the information provided in the physical image file which means opening the target's backing chain completely anew, just as it has been done already. If the target's backing chain shares images with the source, this may lead to multiple BDSs per physical image file. But since we cannot reliably ascertain this case, there is nothing we can do about it. Signed-off-by: Max Reitz <mreitz@redhat.com> Message-id: 20160610185750.30956-3-mreitz@redhat.com Reviewed-by: Kevin Wolf <kwolf@redhat.com> Reviewed-by: Fam Zheng <famz@redhat.com> Signed-off-by: Max Reitz <mreitz@redhat.com>
2016-06-11 02:57:47 +08:00
MirrorSyncMode mode, BlockMirrorBackingMode backing_mode,
bool zero_target,
block/mirror: Fix target backing BDS Currently, we are trying to move the backing BDS from the source to the target in bdrv_replace_in_backing_chain() which is called from mirror_exit(). However, mirror_complete() already tries to open the target's backing chain with a call to bdrv_open_backing_file(). First, we should only set the target's backing BDS once. Second, the mirroring block job has a better idea of what to set it to than the generic code in bdrv_replace_in_backing_chain() (in fact, the latter's conditions on when to move the backing BDS from source to target are not really correct). Therefore, remove that code from bdrv_replace_in_backing_chain() and leave it to mirror_complete(). Depending on what kind of mirroring is performed, we furthermore want to use different strategies to open the target's backing chain: - If blockdev-mirror is used, we can assume the user made sure that the target already has the correct backing chain. In particular, we should not try to open a backing file if the target does not have any yet. - If drive-mirror with mode=absolute-paths is used, we can and should reuse the already existing chain of nodes that the source BDS is in. In case of sync=full, no backing BDS is required; with sync=top, we just link the source's backing BDS to the target, and with sync=none, we use the source BDS as the target's backing BDS. We should not try to open these backing files anew because this would lead to two BDSs existing per physical file in the backing chain, and we would like to avoid such concurrent access. - If drive-mirror with mode=existing is used, we have to use the information provided in the physical image file which means opening the target's backing chain completely anew, just as it has been done already. If the target's backing chain shares images with the source, this may lead to multiple BDSs per physical image file. But since we cannot reliably ascertain this case, there is nothing we can do about it. Signed-off-by: Max Reitz <mreitz@redhat.com> Message-id: 20160610185750.30956-3-mreitz@redhat.com Reviewed-by: Kevin Wolf <kwolf@redhat.com> Reviewed-by: Fam Zheng <famz@redhat.com> Signed-off-by: Max Reitz <mreitz@redhat.com>
2016-06-11 02:57:47 +08:00
BlockdevOnError on_source_error,
BlockdevOnError on_target_error,
bool unmap, const char *filter_node_name,
MirrorCopyMode copy_mode, Error **errp);
mirror: introduce mirror job This patch adds the implementation of a new job that mirrors a disk to a new image while letting the guest continue using the old image. The target is treated as a "black box" and data is copied from the source to the target in the background. This can be used for several purposes, including storage migration, continuous replication, and observation of the guest I/O in an external program. It is also a first step in replacing the inefficient block migration code that is part of QEMU. The job is possibly never-ending, but it is logically structured into two phases: 1) copy all data as fast as possible until the target first gets in sync with the source; 2) keep target in sync and ensure that reopening to the target gets a correct (full) copy of the source data. The second phase is indicated by the progress in "info block-jobs" reporting the current offset to be equal to the length of the file. When the job is cancelled in the second phase, QEMU will run the job until the source is clean and quiescent, then it will report successful completion of the job. In other words, the BLOCK_JOB_CANCELLED event means that the target may _not_ be consistent with a past state of the source; the BLOCK_JOB_COMPLETED event means that the target is consistent with a past state of the source. (Note that it could already happen that management lost the race against QEMU and got a completion event instead of cancellation). It is not yet possible to complete the job and switch over to the target disk. The next patches will fix this and add many refinements to the basic idea introduced here. These include improved error management, some tunable knobs and performance optimizations. Signed-off-by: Paolo Bonzini <pbonzini@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2012-10-18 22:49:23 +08:00
block: add basic backup support to block driver backup_start() creates a block job that copies a point-in-time snapshot of a block device to a target block device. We call backup_do_cow() for each write during backup. That function reads the original data from the block device before it gets overwritten. The data is then written to the target device. Currently backup cluster size is hardcoded to 65536 bytes. [I made a number of changes to Dietmar's original patch and folded them in to make code review easy. Here is the full list: * Drop BackupDumpFunc interface in favor of a target block device * Detect zero clusters with buffer_is_zero() and use bdrv_co_write_zeroes() * Use 0 delay instead of 1us, like other block jobs * Unify creation/start functions into backup_start() * Simplify cleanup, free bitmap in backup_run() instead of cb * function * Use HBitmap to avoid duplicating bitmap code * Use bdrv_getlength() instead of accessing ->total_sectors * directly * Delete the backup.h header file, it is no longer necessary * Move ./backup.c to block/backup.c * Remove #ifdefed out code * Coding style and whitespace cleanups * Use bdrv_add_before_write_notifier() instead of blockjob-specific hooks * Keep our own in-flight CowRequest list instead of using block.c tracked requests. This means a little code duplication but is much simpler than trying to share the tracked requests list and use the backup block size. * Add on_source_error and on_target_error error handling. * Use trace events instead of DPRINTF() -- stefanha] Signed-off-by: Dietmar Maurer <dietmar@proxmox.com> Signed-off-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2013-06-24 23:13:11 +08:00
/*
* backup_job_create:
* @job_id: The id of the newly-created job, or %NULL to use the
* device name of @bs.
block: add basic backup support to block driver backup_start() creates a block job that copies a point-in-time snapshot of a block device to a target block device. We call backup_do_cow() for each write during backup. That function reads the original data from the block device before it gets overwritten. The data is then written to the target device. Currently backup cluster size is hardcoded to 65536 bytes. [I made a number of changes to Dietmar's original patch and folded them in to make code review easy. Here is the full list: * Drop BackupDumpFunc interface in favor of a target block device * Detect zero clusters with buffer_is_zero() and use bdrv_co_write_zeroes() * Use 0 delay instead of 1us, like other block jobs * Unify creation/start functions into backup_start() * Simplify cleanup, free bitmap in backup_run() instead of cb * function * Use HBitmap to avoid duplicating bitmap code * Use bdrv_getlength() instead of accessing ->total_sectors * directly * Delete the backup.h header file, it is no longer necessary * Move ./backup.c to block/backup.c * Remove #ifdefed out code * Coding style and whitespace cleanups * Use bdrv_add_before_write_notifier() instead of blockjob-specific hooks * Keep our own in-flight CowRequest list instead of using block.c tracked requests. This means a little code duplication but is much simpler than trying to share the tracked requests list and use the backup block size. * Add on_source_error and on_target_error error handling. * Use trace events instead of DPRINTF() -- stefanha] Signed-off-by: Dietmar Maurer <dietmar@proxmox.com> Signed-off-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2013-06-24 23:13:11 +08:00
* @bs: Block device to operate on.
* @target: Block device to write to.
* @speed: The maximum speed, in bytes per second, or 0 for unlimited.
Implement sync modes for drive-backup. This patch adds sync-modes to the drive-backup interface and implements the FULL, NONE and TOP modes of synchronization. FULL performs as before copying the entire contents of the drive while preserving the point-in-time using CoW. NONE only copies new writes to the target drive. TOP copies changes to the topmost drive image and preserves the point-in-time using CoW. For sync mode TOP are creating a new target image using the same backing file as the original disk image. Then any new data that has been laid on top of it since creation is copied in the main backup_run() loop. There is an extra check in the 'TOP' case so that we don't bother to copy all the data of the backing file as it already exists in the target. This is where the bdrv_co_is_allocated() is used to determine if the data exists in the topmost layer or below. Also any new data being written is intercepted via the write_notifier hook which ends up calling backup_do_cow() to copy old data out before it gets overwritten. For mode 'NONE' we create the new target image and only copy in the original data from the disk image starting from the time the call was made. This preserves the point in time data by only copying the parts that are *going to change* to the target image. This way we can reconstruct the final image by checking to see if the given block exists in the new target image first, and if it does not, you can get it from the original image. This is basically an optimization allowing you to do point-in-time snapshots with low overhead vs the 'FULL' version. Since there is no old data to copy out the loop in backup_run() for the NONE case just calls qemu_coroutine_yield() which only wakes up after an event (usually cancel in this case). The rest is handled by the before_write notifier which again calls backup_do_cow() to write out the old data so it can be preserved. Signed-off-by: Ian Main <imain@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2013-07-27 02:39:04 +08:00
* @sync_mode: What parts of the disk image should be copied to the destination.
* @sync_bitmap: The dirty bitmap if sync_mode is 'bitmap' or 'incremental'
* @bitmap_mode: The bitmap synchronization policy to use.
block: add basic backup support to block driver backup_start() creates a block job that copies a point-in-time snapshot of a block device to a target block device. We call backup_do_cow() for each write during backup. That function reads the original data from the block device before it gets overwritten. The data is then written to the target device. Currently backup cluster size is hardcoded to 65536 bytes. [I made a number of changes to Dietmar's original patch and folded them in to make code review easy. Here is the full list: * Drop BackupDumpFunc interface in favor of a target block device * Detect zero clusters with buffer_is_zero() and use bdrv_co_write_zeroes() * Use 0 delay instead of 1us, like other block jobs * Unify creation/start functions into backup_start() * Simplify cleanup, free bitmap in backup_run() instead of cb * function * Use HBitmap to avoid duplicating bitmap code * Use bdrv_getlength() instead of accessing ->total_sectors * directly * Delete the backup.h header file, it is no longer necessary * Move ./backup.c to block/backup.c * Remove #ifdefed out code * Coding style and whitespace cleanups * Use bdrv_add_before_write_notifier() instead of blockjob-specific hooks * Keep our own in-flight CowRequest list instead of using block.c tracked requests. This means a little code duplication but is much simpler than trying to share the tracked requests list and use the backup block size. * Add on_source_error and on_target_error error handling. * Use trace events instead of DPRINTF() -- stefanha] Signed-off-by: Dietmar Maurer <dietmar@proxmox.com> Signed-off-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2013-06-24 23:13:11 +08:00
* @on_source_error: The action to take upon error reading from the source.
* @on_target_error: The action to take upon error writing to the target.
* @creation_flags: Flags that control the behavior of the Job lifetime.
* See @BlockJobCreateFlags
block: add basic backup support to block driver backup_start() creates a block job that copies a point-in-time snapshot of a block device to a target block device. We call backup_do_cow() for each write during backup. That function reads the original data from the block device before it gets overwritten. The data is then written to the target device. Currently backup cluster size is hardcoded to 65536 bytes. [I made a number of changes to Dietmar's original patch and folded them in to make code review easy. Here is the full list: * Drop BackupDumpFunc interface in favor of a target block device * Detect zero clusters with buffer_is_zero() and use bdrv_co_write_zeroes() * Use 0 delay instead of 1us, like other block jobs * Unify creation/start functions into backup_start() * Simplify cleanup, free bitmap in backup_run() instead of cb * function * Use HBitmap to avoid duplicating bitmap code * Use bdrv_getlength() instead of accessing ->total_sectors * directly * Delete the backup.h header file, it is no longer necessary * Move ./backup.c to block/backup.c * Remove #ifdefed out code * Coding style and whitespace cleanups * Use bdrv_add_before_write_notifier() instead of blockjob-specific hooks * Keep our own in-flight CowRequest list instead of using block.c tracked requests. This means a little code duplication but is much simpler than trying to share the tracked requests list and use the backup block size. * Add on_source_error and on_target_error error handling. * Use trace events instead of DPRINTF() -- stefanha] Signed-off-by: Dietmar Maurer <dietmar@proxmox.com> Signed-off-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2013-06-24 23:13:11 +08:00
* @cb: Completion function for the job.
* @opaque: Opaque pointer value passed to @cb.
* @txn: Transaction that this job is part of (may be NULL).
block: add basic backup support to block driver backup_start() creates a block job that copies a point-in-time snapshot of a block device to a target block device. We call backup_do_cow() for each write during backup. That function reads the original data from the block device before it gets overwritten. The data is then written to the target device. Currently backup cluster size is hardcoded to 65536 bytes. [I made a number of changes to Dietmar's original patch and folded them in to make code review easy. Here is the full list: * Drop BackupDumpFunc interface in favor of a target block device * Detect zero clusters with buffer_is_zero() and use bdrv_co_write_zeroes() * Use 0 delay instead of 1us, like other block jobs * Unify creation/start functions into backup_start() * Simplify cleanup, free bitmap in backup_run() instead of cb * function * Use HBitmap to avoid duplicating bitmap code * Use bdrv_getlength() instead of accessing ->total_sectors * directly * Delete the backup.h header file, it is no longer necessary * Move ./backup.c to block/backup.c * Remove #ifdefed out code * Coding style and whitespace cleanups * Use bdrv_add_before_write_notifier() instead of blockjob-specific hooks * Keep our own in-flight CowRequest list instead of using block.c tracked requests. This means a little code duplication but is much simpler than trying to share the tracked requests list and use the backup block size. * Add on_source_error and on_target_error error handling. * Use trace events instead of DPRINTF() -- stefanha] Signed-off-by: Dietmar Maurer <dietmar@proxmox.com> Signed-off-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2013-06-24 23:13:11 +08:00
*
* Create a backup operation on @bs. Clusters in @bs are written to @target
block: add basic backup support to block driver backup_start() creates a block job that copies a point-in-time snapshot of a block device to a target block device. We call backup_do_cow() for each write during backup. That function reads the original data from the block device before it gets overwritten. The data is then written to the target device. Currently backup cluster size is hardcoded to 65536 bytes. [I made a number of changes to Dietmar's original patch and folded them in to make code review easy. Here is the full list: * Drop BackupDumpFunc interface in favor of a target block device * Detect zero clusters with buffer_is_zero() and use bdrv_co_write_zeroes() * Use 0 delay instead of 1us, like other block jobs * Unify creation/start functions into backup_start() * Simplify cleanup, free bitmap in backup_run() instead of cb * function * Use HBitmap to avoid duplicating bitmap code * Use bdrv_getlength() instead of accessing ->total_sectors * directly * Delete the backup.h header file, it is no longer necessary * Move ./backup.c to block/backup.c * Remove #ifdefed out code * Coding style and whitespace cleanups * Use bdrv_add_before_write_notifier() instead of blockjob-specific hooks * Keep our own in-flight CowRequest list instead of using block.c tracked requests. This means a little code duplication but is much simpler than trying to share the tracked requests list and use the backup block size. * Add on_source_error and on_target_error error handling. * Use trace events instead of DPRINTF() -- stefanha] Signed-off-by: Dietmar Maurer <dietmar@proxmox.com> Signed-off-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2013-06-24 23:13:11 +08:00
* until the job is cancelled or manually completed.
*/
BlockJob *backup_job_create(const char *job_id, BlockDriverState *bs,
BlockDriverState *target, int64_t speed,
MirrorSyncMode sync_mode,
BdrvDirtyBitmap *sync_bitmap,
BitmapSyncMode bitmap_mode,
bool compress,
block/backup: use backup-top instead of write notifiers Drop write notifiers and use filter node instead. = Changes = 1. Add filter-node-name argument for backup qmp api. We have to do it in this commit, as 257 needs to be fixed. 2. There are no more write notifiers here, so is_write_notifier parameter is dropped from block-copy paths. 3. To sync with in-flight requests at job finish we now have drained removing of the filter, we don't need rw-lock. 4. Block-copy is now using BdrvChildren instead of BlockBackends 5. As backup-top owns these children, we also move block-copy state into backup-top's ownership. = Iotest changes = 56: op-blocker doesn't shoot now, as we set it on source, but then check on filter, when trying to start second backup. To keep the test we instead can catch another collision: both jobs will get 'drive0' job-id, as job-id parameter is unspecified. To prevent interleaving with file-posix locks (as they are dependent on config) let's use another target for second backup. Also, it's obvious now that we'd like to drop this op-blocker at all and add a test-case for two backups from one node (to different destinations) actually works. But not in these series. 141: Output changed: prepatch, "Node is in use" comes from bdrv_has_blk check inside qmp_blockdev_del. But we've dropped block-copy blk objects, so no more blk objects on source bs (job blk is on backup-top filter bs). New message is from op-blocker, which is the next check in qmp_blockdev_add. 257: The test wants to emulate guest write during backup. They should go to filter node, not to original source node, of course. Therefore we need to specify filter node name and use it. Signed-off-by: Vladimir Sementsov-Ogievskiy <vsementsov@virtuozzo.com> Message-id: 20191001131409.14202-6-vsementsov@virtuozzo.com Reviewed-by: Max Reitz <mreitz@redhat.com> Signed-off-by: Max Reitz <mreitz@redhat.com>
2019-10-01 21:14:09 +08:00
const char *filter_node_name,
BlockdevOnError on_source_error,
BlockdevOnError on_target_error,
int creation_flags,
BlockCompletionFunc *cb, void *opaque,
JobTxn *txn, Error **errp);
block: add basic backup support to block driver backup_start() creates a block job that copies a point-in-time snapshot of a block device to a target block device. We call backup_do_cow() for each write during backup. That function reads the original data from the block device before it gets overwritten. The data is then written to the target device. Currently backup cluster size is hardcoded to 65536 bytes. [I made a number of changes to Dietmar's original patch and folded them in to make code review easy. Here is the full list: * Drop BackupDumpFunc interface in favor of a target block device * Detect zero clusters with buffer_is_zero() and use bdrv_co_write_zeroes() * Use 0 delay instead of 1us, like other block jobs * Unify creation/start functions into backup_start() * Simplify cleanup, free bitmap in backup_run() instead of cb * function * Use HBitmap to avoid duplicating bitmap code * Use bdrv_getlength() instead of accessing ->total_sectors * directly * Delete the backup.h header file, it is no longer necessary * Move ./backup.c to block/backup.c * Remove #ifdefed out code * Coding style and whitespace cleanups * Use bdrv_add_before_write_notifier() instead of blockjob-specific hooks * Keep our own in-flight CowRequest list instead of using block.c tracked requests. This means a little code duplication but is much simpler than trying to share the tracked requests list and use the backup block size. * Add on_source_error and on_target_error error handling. * Use trace events instead of DPRINTF() -- stefanha] Signed-off-by: Dietmar Maurer <dietmar@proxmox.com> Signed-off-by: Stefan Hajnoczi <stefanha@redhat.com> Signed-off-by: Kevin Wolf <kwolf@redhat.com>
2013-06-24 23:13:11 +08:00
void hmp_drive_add_node(Monitor *mon, const char *optstr);
BdrvChild *bdrv_root_attach_child(BlockDriverState *child_bs,
const char *child_name,
const BdrvChildRole *child_role,
AioContext *ctx,
uint64_t perm, uint64_t shared_perm,
void *opaque, Error **errp);
void bdrv_root_unref_child(BdrvChild *child);
/**
* Sets a BdrvChild's permissions. Avoid if the parent is a BDS; use
* bdrv_child_refresh_perms() instead and make the parent's
* .bdrv_child_perm() implementation return the correct values.
*/
int bdrv_child_try_set_perm(BdrvChild *c, uint64_t perm, uint64_t shared,
Error **errp);
/**
* Calls bs->drv->bdrv_child_perm() and updates the child's permission
* masks with the result.
* Drivers should invoke this function whenever an event occurs that
* makes their .bdrv_child_perm() implementation return different
* values than before, but which will not result in the block layer
* automatically refreshing the permissions.
*/
int bdrv_child_refresh_perms(BlockDriverState *bs, BdrvChild *c, Error **errp);
/* Default implementation for BlockDriver.bdrv_child_perm() that can be used by
* block filters: Forward CONSISTENT_READ, WRITE, WRITE_UNCHANGED and RESIZE to
* all children */
void bdrv_filter_default_perms(BlockDriverState *bs, BdrvChild *c,
const BdrvChildRole *role,
BlockReopenQueue *reopen_queue,
uint64_t perm, uint64_t shared,
uint64_t *nperm, uint64_t *nshared);
/* Default implementation for BlockDriver.bdrv_child_perm() that can be used by
* (non-raw) image formats: Like above for bs->backing, but for bs->file it
* requires WRITE | RESIZE for read-write images, always requires
* CONSISTENT_READ and doesn't share WRITE. */
void bdrv_format_default_perms(BlockDriverState *bs, BdrvChild *c,
const BdrvChildRole *role,
BlockReopenQueue *reopen_queue,
uint64_t perm, uint64_t shared,
uint64_t *nperm, uint64_t *nshared);
/*
* Default implementation for drivers to pass bdrv_co_block_status() to
* their file.
*/
int coroutine_fn bdrv_co_block_status_from_file(BlockDriverState *bs,
bool want_zero,
int64_t offset,
int64_t bytes,
int64_t *pnum,
int64_t *map,
BlockDriverState **file);
/*
* Default implementation for drivers to pass bdrv_co_block_status() to
* their backing file.
*/
int coroutine_fn bdrv_co_block_status_from_backing(BlockDriverState *bs,
bool want_zero,
int64_t offset,
int64_t bytes,
int64_t *pnum,
int64_t *map,
BlockDriverState **file);
const char *bdrv_get_parent_name(const BlockDriverState *bs);
void blk_dev_change_media_cb(BlockBackend *blk, bool load, Error **errp);
bool blk_dev_has_removable_media(BlockBackend *blk);
bool blk_dev_has_tray(BlockBackend *blk);
void blk_dev_eject_request(BlockBackend *blk, bool force);
bool blk_dev_is_tray_open(BlockBackend *blk);
bool blk_dev_is_medium_locked(BlockBackend *blk);
void bdrv_set_dirty(BlockDriverState *bs, int64_t offset, int64_t bytes);
void bdrv_clear_dirty_bitmap(BdrvDirtyBitmap *bitmap, HBitmap **out);
void bdrv_restore_dirty_bitmap(BdrvDirtyBitmap *bitmap, HBitmap *backup);
bool bdrv_dirty_bitmap_merge_internal(BdrvDirtyBitmap *dest,
const BdrvDirtyBitmap *src,
HBitmap **backup, bool lock);
void bdrv_inc_in_flight(BlockDriverState *bs);
void bdrv_dec_in_flight(BlockDriverState *bs);
void blockdev_close_all_bdrv_states(void);
int coroutine_fn bdrv_co_copy_range_from(BdrvChild *src, uint64_t src_offset,
BdrvChild *dst, uint64_t dst_offset,
uint64_t bytes,
BdrvRequestFlags read_flags,
BdrvRequestFlags write_flags);
int coroutine_fn bdrv_co_copy_range_to(BdrvChild *src, uint64_t src_offset,
BdrvChild *dst, uint64_t dst_offset,
uint64_t bytes,
BdrvRequestFlags read_flags,
BdrvRequestFlags write_flags);
int refresh_total_sectors(BlockDriverState *bs, int64_t hint);
#endif /* BLOCK_INT_H */