2006-01-08 17:01:45 +08:00
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/*
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* SLOB Allocator: Simple List Of Blocks
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*
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* Matt Mackall <mpm@selenic.com> 12/30/03
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*
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* How SLOB works:
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*
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* The core of SLOB is a traditional K&R style heap allocator, with
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* support for returning aligned objects. The granularity of this
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slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
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* allocator is 4 bytes on 32-bit and 8 bytes on 64-bit, though it
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* could be as low as 2 if the compiler alignment requirements allow.
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*
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* The slob heap is a linked list of pages from __get_free_page, and
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* within each page, there is a singly-linked list of free blocks (slob_t).
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* The heap is grown on demand and allocation from the heap is currently
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* first-fit.
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2006-01-08 17:01:45 +08:00
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*
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* Above this is an implementation of kmalloc/kfree. Blocks returned
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
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* from kmalloc are 4-byte aligned and prepended with a 4-byte header.
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2006-01-08 17:01:45 +08:00
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* If kmalloc is asked for objects of PAGE_SIZE or larger, it calls
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2007-07-16 14:38:08 +08:00
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* __get_free_pages directly, allocating compound pages so the page order
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* does not have to be separately tracked, and also stores the exact
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* allocation size in page->private so that it can be used to accurately
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* provide ksize(). These objects are detected in kfree() because slob_page()
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* is false for them.
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2006-01-08 17:01:45 +08:00
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*
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* SLAB is emulated on top of SLOB by simply calling constructors and
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
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* destructors for every SLAB allocation. Objects are returned with the
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* 4-byte alignment unless the SLAB_HWCACHE_ALIGN flag is set, in which
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* case the low-level allocator will fragment blocks to create the proper
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* alignment. Again, objects of page-size or greater are allocated by
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* calling __get_free_pages. As SLAB objects know their size, no separate
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* size bookkeeping is necessary and there is essentially no allocation
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2007-07-16 14:38:08 +08:00
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* space overhead, and compound pages aren't needed for multi-page
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* allocations.
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2006-01-08 17:01:45 +08:00
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*/
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|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
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#include <linux/kernel.h>
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2006-01-08 17:01:45 +08:00
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#include <linux/slab.h>
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#include <linux/mm.h>
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#include <linux/cache.h>
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#include <linux/init.h>
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#include <linux/module.h>
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2007-05-17 13:10:49 +08:00
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#include <linux/rcupdate.h>
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
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#include <linux/list.h>
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#include <asm/atomic.h>
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/* SLOB_MIN_ALIGN == sizeof(long) */
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#if BITS_PER_BYTE == 32
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#define SLOB_MIN_ALIGN 4
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#else
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#define SLOB_MIN_ALIGN 8
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#endif
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2006-01-08 17:01:45 +08:00
|
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|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
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/*
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* slob_block has a field 'units', which indicates size of block if +ve,
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* or offset of next block if -ve (in SLOB_UNITs).
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*
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* Free blocks of size 1 unit simply contain the offset of the next block.
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* Those with larger size contain their size in the first SLOB_UNIT of
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* memory, and the offset of the next free block in the second SLOB_UNIT.
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*/
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#if PAGE_SIZE <= (32767 * SLOB_MIN_ALIGN)
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typedef s16 slobidx_t;
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#else
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typedef s32 slobidx_t;
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#endif
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/*
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* Align struct slob_block to long for now, but can some embedded
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* architectures get away with less?
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*/
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2006-01-08 17:01:45 +08:00
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struct slob_block {
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
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slobidx_t units;
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} __attribute__((aligned(SLOB_MIN_ALIGN)));
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2006-01-08 17:01:45 +08:00
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typedef struct slob_block slob_t;
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|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
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/*
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* We use struct page fields to manage some slob allocation aspects,
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* however to avoid the horrible mess in include/linux/mm_types.h, we'll
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* just define our own struct page type variant here.
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*/
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struct slob_page {
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union {
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struct {
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unsigned long flags; /* mandatory */
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atomic_t _count; /* mandatory */
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slobidx_t units; /* free units left in page */
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unsigned long pad[2];
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slob_t *free; /* first free slob_t in page */
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struct list_head list; /* linked list of free pages */
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};
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struct page page;
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};
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};
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static inline void struct_slob_page_wrong_size(void)
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{ BUILD_BUG_ON(sizeof(struct slob_page) != sizeof(struct page)); }
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/*
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* free_slob_page: call before a slob_page is returned to the page allocator.
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*/
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static inline void free_slob_page(struct slob_page *sp)
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{
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reset_page_mapcount(&sp->page);
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sp->page.mapping = NULL;
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}
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/*
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* All (partially) free slob pages go on this list.
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*/
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static LIST_HEAD(free_slob_pages);
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/*
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* slob_page: True for all slob pages (false for bigblock pages)
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*/
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static inline int slob_page(struct slob_page *sp)
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{
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return test_bit(PG_active, &sp->flags);
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}
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static inline void set_slob_page(struct slob_page *sp)
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{
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__set_bit(PG_active, &sp->flags);
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}
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static inline void clear_slob_page(struct slob_page *sp)
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|
|
{
|
|
|
|
__clear_bit(PG_active, &sp->flags);
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* slob_page_free: true for pages on free_slob_pages list.
|
|
|
|
*/
|
|
|
|
static inline int slob_page_free(struct slob_page *sp)
|
|
|
|
{
|
|
|
|
return test_bit(PG_private, &sp->flags);
|
|
|
|
}
|
|
|
|
|
|
|
|
static inline void set_slob_page_free(struct slob_page *sp)
|
|
|
|
{
|
|
|
|
list_add(&sp->list, &free_slob_pages);
|
|
|
|
__set_bit(PG_private, &sp->flags);
|
|
|
|
}
|
|
|
|
|
|
|
|
static inline void clear_slob_page_free(struct slob_page *sp)
|
|
|
|
{
|
|
|
|
list_del(&sp->list);
|
|
|
|
__clear_bit(PG_private, &sp->flags);
|
|
|
|
}
|
|
|
|
|
2006-01-08 17:01:45 +08:00
|
|
|
#define SLOB_UNIT sizeof(slob_t)
|
|
|
|
#define SLOB_UNITS(size) (((size) + SLOB_UNIT - 1)/SLOB_UNIT)
|
|
|
|
#define SLOB_ALIGN L1_CACHE_BYTES
|
|
|
|
|
2007-05-17 13:10:49 +08:00
|
|
|
/*
|
|
|
|
* struct slob_rcu is inserted at the tail of allocated slob blocks, which
|
|
|
|
* were created with a SLAB_DESTROY_BY_RCU slab. slob_rcu is used to free
|
|
|
|
* the block using call_rcu.
|
|
|
|
*/
|
|
|
|
struct slob_rcu {
|
|
|
|
struct rcu_head head;
|
|
|
|
int size;
|
|
|
|
};
|
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
/*
|
|
|
|
* slob_lock protects all slob allocator structures.
|
|
|
|
*/
|
2006-01-08 17:01:45 +08:00
|
|
|
static DEFINE_SPINLOCK(slob_lock);
|
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
/*
|
|
|
|
* Encode the given size and next info into a free slob block s.
|
|
|
|
*/
|
|
|
|
static void set_slob(slob_t *s, slobidx_t size, slob_t *next)
|
|
|
|
{
|
|
|
|
slob_t *base = (slob_t *)((unsigned long)s & PAGE_MASK);
|
|
|
|
slobidx_t offset = next - base;
|
2006-12-30 08:48:28 +08:00
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
if (size > 1) {
|
|
|
|
s[0].units = size;
|
|
|
|
s[1].units = offset;
|
|
|
|
} else
|
|
|
|
s[0].units = -offset;
|
|
|
|
}
|
2006-01-08 17:01:45 +08:00
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
/*
|
|
|
|
* Return the size of a slob block.
|
|
|
|
*/
|
|
|
|
static slobidx_t slob_units(slob_t *s)
|
|
|
|
{
|
|
|
|
if (s->units > 0)
|
|
|
|
return s->units;
|
|
|
|
return 1;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Return the next free slob block pointer after this one.
|
|
|
|
*/
|
|
|
|
static slob_t *slob_next(slob_t *s)
|
|
|
|
{
|
|
|
|
slob_t *base = (slob_t *)((unsigned long)s & PAGE_MASK);
|
|
|
|
slobidx_t next;
|
|
|
|
|
|
|
|
if (s[0].units < 0)
|
|
|
|
next = -s[0].units;
|
|
|
|
else
|
|
|
|
next = s[1].units;
|
|
|
|
return base+next;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Returns true if s is the last free block in its page.
|
|
|
|
*/
|
|
|
|
static int slob_last(slob_t *s)
|
|
|
|
{
|
|
|
|
return !((unsigned long)slob_next(s) & ~PAGE_MASK);
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Allocate a slob block within a given slob_page sp.
|
|
|
|
*/
|
|
|
|
static void *slob_page_alloc(struct slob_page *sp, size_t size, int align)
|
2006-01-08 17:01:45 +08:00
|
|
|
{
|
|
|
|
slob_t *prev, *cur, *aligned = 0;
|
|
|
|
int delta = 0, units = SLOB_UNITS(size);
|
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
for (prev = NULL, cur = sp->free; ; prev = cur, cur = slob_next(cur)) {
|
|
|
|
slobidx_t avail = slob_units(cur);
|
|
|
|
|
2006-01-08 17:01:45 +08:00
|
|
|
if (align) {
|
|
|
|
aligned = (slob_t *)ALIGN((unsigned long)cur, align);
|
|
|
|
delta = aligned - cur;
|
|
|
|
}
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
if (avail >= units + delta) { /* room enough? */
|
|
|
|
slob_t *next;
|
|
|
|
|
2006-01-08 17:01:45 +08:00
|
|
|
if (delta) { /* need to fragment head to align? */
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
next = slob_next(cur);
|
|
|
|
set_slob(aligned, avail - delta, next);
|
|
|
|
set_slob(cur, delta, aligned);
|
2006-01-08 17:01:45 +08:00
|
|
|
prev = cur;
|
|
|
|
cur = aligned;
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
avail = slob_units(cur);
|
2006-01-08 17:01:45 +08:00
|
|
|
}
|
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
next = slob_next(cur);
|
|
|
|
if (avail == units) { /* exact fit? unlink. */
|
|
|
|
if (prev)
|
|
|
|
set_slob(prev, slob_units(prev), next);
|
|
|
|
else
|
|
|
|
sp->free = next;
|
|
|
|
} else { /* fragment */
|
|
|
|
if (prev)
|
|
|
|
set_slob(prev, slob_units(prev), cur + units);
|
|
|
|
else
|
|
|
|
sp->free = cur + units;
|
|
|
|
set_slob(cur + units, avail - units, next);
|
2006-01-08 17:01:45 +08:00
|
|
|
}
|
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
sp->units -= units;
|
|
|
|
if (!sp->units)
|
|
|
|
clear_slob_page_free(sp);
|
2006-01-08 17:01:45 +08:00
|
|
|
return cur;
|
|
|
|
}
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
if (slob_last(cur))
|
|
|
|
return NULL;
|
|
|
|
}
|
|
|
|
}
|
2006-01-08 17:01:45 +08:00
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
/*
|
|
|
|
* slob_alloc: entry point into the slob allocator.
|
|
|
|
*/
|
|
|
|
static void *slob_alloc(size_t size, gfp_t gfp, int align)
|
|
|
|
{
|
|
|
|
struct slob_page *sp;
|
|
|
|
slob_t *b = NULL;
|
|
|
|
unsigned long flags;
|
2006-01-08 17:01:45 +08:00
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
spin_lock_irqsave(&slob_lock, flags);
|
|
|
|
/* Iterate through each partially free page, try to find room */
|
|
|
|
list_for_each_entry(sp, &free_slob_pages, list) {
|
|
|
|
if (sp->units >= SLOB_UNITS(size)) {
|
|
|
|
b = slob_page_alloc(sp, size, align);
|
|
|
|
if (b)
|
|
|
|
break;
|
2006-01-08 17:01:45 +08:00
|
|
|
}
|
|
|
|
}
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
spin_unlock_irqrestore(&slob_lock, flags);
|
|
|
|
|
|
|
|
/* Not enough space: must allocate a new page */
|
|
|
|
if (!b) {
|
|
|
|
b = (slob_t *)__get_free_page(gfp);
|
|
|
|
if (!b)
|
|
|
|
return 0;
|
|
|
|
sp = (struct slob_page *)virt_to_page(b);
|
|
|
|
set_slob_page(sp);
|
|
|
|
|
|
|
|
spin_lock_irqsave(&slob_lock, flags);
|
|
|
|
sp->units = SLOB_UNITS(PAGE_SIZE);
|
|
|
|
sp->free = b;
|
|
|
|
INIT_LIST_HEAD(&sp->list);
|
|
|
|
set_slob(b, SLOB_UNITS(PAGE_SIZE), b + SLOB_UNITS(PAGE_SIZE));
|
|
|
|
set_slob_page_free(sp);
|
|
|
|
b = slob_page_alloc(sp, size, align);
|
|
|
|
BUG_ON(!b);
|
|
|
|
spin_unlock_irqrestore(&slob_lock, flags);
|
|
|
|
}
|
|
|
|
return b;
|
2006-01-08 17:01:45 +08:00
|
|
|
}
|
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
/*
|
|
|
|
* slob_free: entry point into the slob allocator.
|
|
|
|
*/
|
2006-01-08 17:01:45 +08:00
|
|
|
static void slob_free(void *block, int size)
|
|
|
|
{
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
struct slob_page *sp;
|
|
|
|
slob_t *prev, *next, *b = (slob_t *)block;
|
|
|
|
slobidx_t units;
|
2006-01-08 17:01:45 +08:00
|
|
|
unsigned long flags;
|
|
|
|
|
|
|
|
if (!block)
|
|
|
|
return;
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
BUG_ON(!size);
|
2006-01-08 17:01:45 +08:00
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
sp = (struct slob_page *)virt_to_page(block);
|
|
|
|
units = SLOB_UNITS(size);
|
2006-01-08 17:01:45 +08:00
|
|
|
|
|
|
|
spin_lock_irqsave(&slob_lock, flags);
|
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
if (sp->units + units == SLOB_UNITS(PAGE_SIZE)) {
|
|
|
|
/* Go directly to page allocator. Do not pass slob allocator */
|
|
|
|
if (slob_page_free(sp))
|
|
|
|
clear_slob_page_free(sp);
|
|
|
|
clear_slob_page(sp);
|
|
|
|
free_slob_page(sp);
|
|
|
|
free_page((unsigned long)b);
|
|
|
|
goto out;
|
|
|
|
}
|
2006-01-08 17:01:45 +08:00
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
if (!slob_page_free(sp)) {
|
|
|
|
/* This slob page is about to become partially free. Easy! */
|
|
|
|
sp->units = units;
|
|
|
|
sp->free = b;
|
|
|
|
set_slob(b, units,
|
|
|
|
(void *)((unsigned long)(b +
|
|
|
|
SLOB_UNITS(PAGE_SIZE)) & PAGE_MASK));
|
|
|
|
set_slob_page_free(sp);
|
|
|
|
goto out;
|
|
|
|
}
|
|
|
|
|
|
|
|
/*
|
|
|
|
* Otherwise the page is already partially free, so find reinsertion
|
|
|
|
* point.
|
|
|
|
*/
|
|
|
|
sp->units += units;
|
2006-01-08 17:01:45 +08:00
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
if (b < sp->free) {
|
|
|
|
set_slob(b, units, sp->free);
|
|
|
|
sp->free = b;
|
|
|
|
} else {
|
|
|
|
prev = sp->free;
|
|
|
|
next = slob_next(prev);
|
|
|
|
while (b > next) {
|
|
|
|
prev = next;
|
|
|
|
next = slob_next(prev);
|
|
|
|
}
|
2006-01-08 17:01:45 +08:00
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
if (!slob_last(prev) && b + units == next) {
|
|
|
|
units += slob_units(next);
|
|
|
|
set_slob(b, units, slob_next(next));
|
|
|
|
} else
|
|
|
|
set_slob(b, units, next);
|
|
|
|
|
|
|
|
if (prev + slob_units(prev) == b) {
|
|
|
|
units = slob_units(b) + slob_units(prev);
|
|
|
|
set_slob(prev, units, slob_next(b));
|
|
|
|
} else
|
|
|
|
set_slob(prev, slob_units(prev), b);
|
|
|
|
}
|
|
|
|
out:
|
2006-01-08 17:01:45 +08:00
|
|
|
spin_unlock_irqrestore(&slob_lock, flags);
|
|
|
|
}
|
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
/*
|
|
|
|
* End of slob allocator proper. Begin kmem_cache_alloc and kmalloc frontend.
|
|
|
|
*/
|
|
|
|
|
2006-12-13 16:34:23 +08:00
|
|
|
void *__kmalloc(size_t size, gfp_t gfp)
|
2006-01-08 17:01:45 +08:00
|
|
|
{
|
|
|
|
if (size < PAGE_SIZE - SLOB_UNIT) {
|
2007-07-16 14:38:08 +08:00
|
|
|
slob_t *m;
|
2006-01-08 17:01:45 +08:00
|
|
|
m = slob_alloc(size + SLOB_UNIT, gfp, 0);
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
if (m)
|
|
|
|
m->units = size;
|
|
|
|
return m+1;
|
2007-07-16 14:38:08 +08:00
|
|
|
} else {
|
|
|
|
void *ret;
|
|
|
|
|
|
|
|
ret = (void *) __get_free_pages(gfp | __GFP_COMP,
|
|
|
|
get_order(size));
|
|
|
|
if (ret) {
|
|
|
|
struct page *page;
|
|
|
|
page = virt_to_page(ret);
|
|
|
|
page->private = size;
|
|
|
|
}
|
|
|
|
return ret;
|
2006-01-08 17:01:45 +08:00
|
|
|
}
|
|
|
|
}
|
2006-12-13 16:34:23 +08:00
|
|
|
EXPORT_SYMBOL(__kmalloc);
|
2006-01-08 17:01:45 +08:00
|
|
|
|
2007-05-07 05:48:40 +08:00
|
|
|
/**
|
|
|
|
* krealloc - reallocate memory. The contents will remain unchanged.
|
|
|
|
*
|
|
|
|
* @p: object to reallocate memory for.
|
|
|
|
* @new_size: how many bytes of memory are required.
|
|
|
|
* @flags: the type of memory to allocate.
|
|
|
|
*
|
|
|
|
* The contents of the object pointed to are preserved up to the
|
|
|
|
* lesser of the new and old sizes. If @p is %NULL, krealloc()
|
|
|
|
* behaves exactly like kmalloc(). If @size is 0 and @p is not a
|
|
|
|
* %NULL pointer, the object pointed to is freed.
|
|
|
|
*/
|
|
|
|
void *krealloc(const void *p, size_t new_size, gfp_t flags)
|
|
|
|
{
|
|
|
|
void *ret;
|
|
|
|
|
|
|
|
if (unlikely(!p))
|
|
|
|
return kmalloc_track_caller(new_size, flags);
|
|
|
|
|
|
|
|
if (unlikely(!new_size)) {
|
|
|
|
kfree(p);
|
|
|
|
return NULL;
|
|
|
|
}
|
|
|
|
|
|
|
|
ret = kmalloc_track_caller(new_size, flags);
|
|
|
|
if (ret) {
|
|
|
|
memcpy(ret, p, min(new_size, ksize(p)));
|
|
|
|
kfree(p);
|
|
|
|
}
|
|
|
|
return ret;
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL(krealloc);
|
|
|
|
|
2006-01-08 17:01:45 +08:00
|
|
|
void kfree(const void *block)
|
|
|
|
{
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
struct slob_page *sp;
|
2006-01-08 17:01:45 +08:00
|
|
|
|
|
|
|
if (!block)
|
|
|
|
return;
|
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
sp = (struct slob_page *)virt_to_page(block);
|
2007-07-16 14:38:08 +08:00
|
|
|
if (slob_page(sp)) {
|
|
|
|
slob_t *m = (slob_t *)block - 1;
|
|
|
|
slob_free(m, m->units + SLOB_UNIT);
|
|
|
|
} else
|
|
|
|
put_page(&sp->page);
|
2006-01-08 17:01:45 +08:00
|
|
|
}
|
|
|
|
|
|
|
|
EXPORT_SYMBOL(kfree);
|
|
|
|
|
2007-07-16 14:38:08 +08:00
|
|
|
/* can't use ksize for kmem_cache_alloc memory, only kmalloc */
|
2007-05-07 05:48:40 +08:00
|
|
|
size_t ksize(const void *block)
|
2006-01-08 17:01:45 +08:00
|
|
|
{
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
struct slob_page *sp;
|
2006-01-08 17:01:45 +08:00
|
|
|
|
|
|
|
if (!block)
|
|
|
|
return 0;
|
|
|
|
|
slob: rework freelist handling
Improve slob by turning the freelist into a list of pages using struct page
fields, then each page has a singly linked freelist of slob blocks via a
pointer in the struct page.
- The first benefit is that the slob freelists can be indexed by a smaller
type (2 bytes, if the PAGE_SIZE is reasonable).
- Next is that freeing is much quicker because it does not have to traverse
the entire freelist. Allocation can be slightly faster too, because we can
skip almost-full freelist pages completely.
- Slob pages are then freed immediately when they become empty, rather than
having a periodic timer try to free them. This gives efficiency and memory
consumption improvement.
Then, we don't encode seperate size and next fields into each slob block,
rather we use the sign bit to distinguish between "size" or "next". Then
size 1 blocks contain a "next" offset, and others contain the "size" in
the first unit and "next" in the second unit.
- This allows minimum slob allocation alignment to go from 8 bytes to 2
bytes on 32-bit and 12 bytes to 2 bytes on 64-bit. In practice, it is
best to align them to word size, however some architectures (eg. cris)
could gain space savings from turning off this extra alignment.
Then, make kmalloc use its own slob_block at the front of the allocation
in order to encode allocation size, rather than rely on not overwriting
slob's existing header block.
- This reduces kmalloc allocation overhead similarly to alignment reductions.
- Decouples kmalloc layer from the slob allocator.
Then, add a page flag specific to slob pages.
- This means kfree of a page aligned slob block doesn't have to traverse
the bigblock list.
I would get benchmarks, but my test box's network doesn't come up with
slob before this patch. I think something is timing out. Anyway, things
are faster after the patch.
Code size goes up about 1K, however dynamic memory usage _should_ be
lower even on relatively small memory systems.
Future todo item is to restore the cyclic free list search, rather than
to always begin at the start.
Signed-off-by: Nick Piggin <npiggin@suse.de>
Acked-by: Matt Mackall <mpm@selenic.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-07-16 14:38:07 +08:00
|
|
|
sp = (struct slob_page *)virt_to_page(block);
|
2007-07-16 14:38:08 +08:00
|
|
|
if (slob_page(sp))
|
|
|
|
return ((slob_t *)block - 1)->units + SLOB_UNIT;
|
|
|
|
else
|
|
|
|
return sp->page.private;
|
2006-01-08 17:01:45 +08:00
|
|
|
}
|
|
|
|
|
|
|
|
struct kmem_cache {
|
|
|
|
unsigned int size, align;
|
2007-05-17 13:10:49 +08:00
|
|
|
unsigned long flags;
|
2006-01-08 17:01:45 +08:00
|
|
|
const char *name;
|
|
|
|
void (*ctor)(void *, struct kmem_cache *, unsigned long);
|
|
|
|
};
|
|
|
|
|
|
|
|
struct kmem_cache *kmem_cache_create(const char *name, size_t size,
|
|
|
|
size_t align, unsigned long flags,
|
|
|
|
void (*ctor)(void*, struct kmem_cache *, unsigned long),
|
|
|
|
void (*dtor)(void*, struct kmem_cache *, unsigned long))
|
|
|
|
{
|
|
|
|
struct kmem_cache *c;
|
|
|
|
|
|
|
|
c = slob_alloc(sizeof(struct kmem_cache), flags, 0);
|
|
|
|
|
|
|
|
if (c) {
|
|
|
|
c->name = name;
|
|
|
|
c->size = size;
|
2007-05-17 13:10:49 +08:00
|
|
|
if (flags & SLAB_DESTROY_BY_RCU) {
|
|
|
|
/* leave room for rcu footer at the end of object */
|
|
|
|
c->size += sizeof(struct slob_rcu);
|
|
|
|
}
|
|
|
|
c->flags = flags;
|
2006-01-08 17:01:45 +08:00
|
|
|
c->ctor = ctor;
|
|
|
|
/* ignore alignment unless it's forced */
|
2007-05-07 05:49:56 +08:00
|
|
|
c->align = (flags & SLAB_HWCACHE_ALIGN) ? SLOB_ALIGN : 0;
|
2006-01-08 17:01:45 +08:00
|
|
|
if (c->align < align)
|
|
|
|
c->align = align;
|
2007-05-07 05:49:52 +08:00
|
|
|
} else if (flags & SLAB_PANIC)
|
|
|
|
panic("Cannot create slab cache %s\n", name);
|
2006-01-08 17:01:45 +08:00
|
|
|
|
|
|
|
return c;
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL(kmem_cache_create);
|
|
|
|
|
[PATCH] Make kmem_cache_destroy() return void
un-, de-, -free, -destroy, -exit, etc functions should in general return
void. Also,
There is very little, say, filesystem driver code can do upon failed
kmem_cache_destroy(). If it will be decided to BUG in this case, BUG
should be put in generic code, instead.
Signed-off-by: Alexey Dobriyan <adobriyan@gmail.com>
Signed-off-by: Andrew Morton <akpm@osdl.org>
Signed-off-by: Linus Torvalds <torvalds@osdl.org>
2006-09-27 16:49:41 +08:00
|
|
|
void kmem_cache_destroy(struct kmem_cache *c)
|
2006-01-08 17:01:45 +08:00
|
|
|
{
|
|
|
|
slob_free(c, sizeof(struct kmem_cache));
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL(kmem_cache_destroy);
|
|
|
|
|
|
|
|
void *kmem_cache_alloc(struct kmem_cache *c, gfp_t flags)
|
|
|
|
{
|
|
|
|
void *b;
|
|
|
|
|
|
|
|
if (c->size < PAGE_SIZE)
|
|
|
|
b = slob_alloc(c->size, flags, c->align);
|
|
|
|
else
|
2007-05-07 05:50:19 +08:00
|
|
|
b = (void *)__get_free_pages(flags, get_order(c->size));
|
2006-01-08 17:01:45 +08:00
|
|
|
|
|
|
|
if (c->ctor)
|
2007-05-17 13:10:57 +08:00
|
|
|
c->ctor(b, c, 0);
|
2006-01-08 17:01:45 +08:00
|
|
|
|
|
|
|
return b;
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL(kmem_cache_alloc);
|
|
|
|
|
2006-03-25 19:06:42 +08:00
|
|
|
void *kmem_cache_zalloc(struct kmem_cache *c, gfp_t flags)
|
|
|
|
{
|
|
|
|
void *ret = kmem_cache_alloc(c, flags);
|
|
|
|
if (ret)
|
|
|
|
memset(ret, 0, c->size);
|
|
|
|
|
|
|
|
return ret;
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL(kmem_cache_zalloc);
|
|
|
|
|
2007-05-17 13:10:49 +08:00
|
|
|
static void __kmem_cache_free(void *b, int size)
|
2006-01-08 17:01:45 +08:00
|
|
|
{
|
2007-05-17 13:10:49 +08:00
|
|
|
if (size < PAGE_SIZE)
|
|
|
|
slob_free(b, size);
|
2006-01-08 17:01:45 +08:00
|
|
|
else
|
2007-05-17 13:10:49 +08:00
|
|
|
free_pages((unsigned long)b, get_order(size));
|
|
|
|
}
|
|
|
|
|
|
|
|
static void kmem_rcu_free(struct rcu_head *head)
|
|
|
|
{
|
|
|
|
struct slob_rcu *slob_rcu = (struct slob_rcu *)head;
|
|
|
|
void *b = (void *)slob_rcu - (slob_rcu->size - sizeof(struct slob_rcu));
|
|
|
|
|
|
|
|
__kmem_cache_free(b, slob_rcu->size);
|
|
|
|
}
|
|
|
|
|
|
|
|
void kmem_cache_free(struct kmem_cache *c, void *b)
|
|
|
|
{
|
|
|
|
if (unlikely(c->flags & SLAB_DESTROY_BY_RCU)) {
|
|
|
|
struct slob_rcu *slob_rcu;
|
|
|
|
slob_rcu = b + (c->size - sizeof(struct slob_rcu));
|
|
|
|
INIT_RCU_HEAD(&slob_rcu->head);
|
|
|
|
slob_rcu->size = c->size;
|
|
|
|
call_rcu(&slob_rcu->head, kmem_rcu_free);
|
|
|
|
} else {
|
|
|
|
__kmem_cache_free(b, c->size);
|
|
|
|
}
|
2006-01-08 17:01:45 +08:00
|
|
|
}
|
|
|
|
EXPORT_SYMBOL(kmem_cache_free);
|
|
|
|
|
|
|
|
unsigned int kmem_cache_size(struct kmem_cache *c)
|
|
|
|
{
|
|
|
|
return c->size;
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL(kmem_cache_size);
|
|
|
|
|
|
|
|
const char *kmem_cache_name(struct kmem_cache *c)
|
|
|
|
{
|
|
|
|
return c->name;
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL(kmem_cache_name);
|
|
|
|
|
2006-12-13 16:34:23 +08:00
|
|
|
int kmem_cache_shrink(struct kmem_cache *d)
|
|
|
|
{
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
EXPORT_SYMBOL(kmem_cache_shrink);
|
|
|
|
|
2006-12-13 16:34:24 +08:00
|
|
|
int kmem_ptr_validate(struct kmem_cache *a, const void *b)
|
2006-12-13 16:34:23 +08:00
|
|
|
{
|
|
|
|
return 0;
|
|
|
|
}
|
|
|
|
|
2006-12-30 08:48:28 +08:00
|
|
|
void __init kmem_cache_init(void)
|
|
|
|
{
|
2006-01-08 17:01:45 +08:00
|
|
|
}
|