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This will allow FS that uses VM_PFNMAP | VM_MIXEDMAP (no page structs) to
get notified when access is a write to a read-only PFN.
This can happen if we mmap() a file then first mmap-read from it to
page-in a read-only PFN, than we mmap-write to the same page.
We need this functionality to fix a DAX bug, where in the scenario above
we fail to set ctime/mtime though we modified the file. An xfstest is
attached to this patchset that shows the failure and the fix. (A DAX
patch will follow)
This functionality is extra important for us, because upon dirtying of a
pmem page we also want to RDMA the page to a remote cluster node.
We define a new pfn_mkwrite and do not reuse page_mkwrite because
1 - The name ;-)
2 - But mainly because it would take a very long and tedious
audit of all page_mkwrite functions of VM_MIXEDMAP/VM_PFNMAP
users. To make sure they do not now CRASH. For example current
DAX code (which this is for) would crash.
If we would want to reuse page_mkwrite, We will need to first
patch all users, so to not-crash-on-no-page. Then enable this
patch. But even if I did that I would not sleep so well at night.
Adding a new vector is the safest thing to do, and is not that
expensive. an extra pointer at a static function vector per driver.
Also the new vector is better for performance, because else we
Will call all current Kernel vectors, so to:
check-ha-no-page-do-nothing and return.
No need to call it from do_shared_fault because do_wp_page is called to
change pte permissions anyway.
Signed-off-by: Yigal Korman <[email protected]>
Signed-off-by: Boaz Harrosh <[email protected]>
Acked-by: Kirill A. Shutemov <[email protected]>
Cc: Matthew Wilcox <[email protected]>
Cc: Jan Kara <[email protected]>
Cc: Hugh Dickins <[email protected]>
Cc: Mel Gorman <[email protected]>
Cc: Dave Chinner <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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A lot of filesystems use generic_file_mmap() and filemap_fault(),
f_op->mmap and vm_ops->fault aren't enough to identify filesystem.
This prints file name, vm_ops->fault, f_op->mmap and a_ops->readpage
(which is almost always implemented and filesystem-specific).
Example:
[ 23.676410] BUG: Bad page map in process sh pte:1b7e6025 pmd:19bbd067
[ 23.676887] page:ffffea00006df980 count:4 mapcount:1 mapping:ffff8800196426c0 index:0x97
[ 23.677481] flags: 0x10000000000000c(referenced|uptodate)
[ 23.677896] page dumped because: bad pte
[ 23.678205] addr:00007f52fcb17000 vm_flags:00000075 anon_vma: (null) mapping:ffff8800196426c0 index:97
[ 23.678922] file:libc-2.19.so fault:filemap_fault mmap:generic_file_readonly_mmap readpage:v9fs_vfs_readpage
[[email protected]: use pr_alert, per Kirill]
Signed-off-by: Konstantin Khlebnikov <[email protected]>
Cc: Sasha Levin <[email protected]>
Acked-by: Kirill A. Shutemov <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Mempools keep allocated objects in reserved for situations when ordinary
allocation may not be possible to satisfy. These objects shouldn't be
accessed before they leave the pool.
This patch poison elements when get into the pool and unpoison when they
leave it. This will let KASan to detect use-after-free of mempool's
elements.
Signed-off-by: Andrey Ryabinin <[email protected]>
Tested-by: David Rientjes <[email protected]>
Cc: Catalin Marinas <[email protected]>
Cc: Dmitry Chernenkov <[email protected]>
Cc: Dmitry Vyukov <[email protected]>
Cc: Alexander Potapenko <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Like EXPORT_SYMBOL(): the positioning communicates that the macro pertains
to the immediately preceding function.
Cc: Dmitry Safonov <[email protected]>
Cc: Michal Nazarewicz <[email protected]>
Cc: Stefan Strogin <[email protected]>
Cc: Marek Szyprowski <[email protected]>
Cc: Joonsoo Kim <[email protected]>
Cc: Pintu Kumar <[email protected]>
Cc: Weijie Yang <[email protected]>
Cc: Laurent Pinchart <[email protected]>
Cc: Vyacheslav Tyrtov <[email protected]>
Cc: Aleksei Mateosian <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Here are two functions that provide interface to compute/get used size and
size of biggest free chunk in cma region. Add that information to
debugfs.
[[email protected]: move debug code from cma.c into cma_debug.c]
[[email protected]: move code from cma_get_used() and cma_get_maxchunk() to cma_used_get() and cma_maxchunk_get()]
Signed-off-by: Dmitry Safonov <[email protected]>
Signed-off-by: Stefan Strogin <[email protected]>
Acked-by: Michal Nazarewicz <[email protected]>
Cc: Marek Szyprowski <[email protected]>
Cc: Joonsoo Kim <[email protected]>
Cc: Pintu Kumar <[email protected]>
Cc: Weijie Yang <[email protected]>
Cc: Laurent Pinchart <[email protected]>
Cc: Vyacheslav Tyrtov <[email protected]>
Cc: Aleksei Mateosian <[email protected]>
Signed-off-by: Stefan Strogin <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Few trivial cleanups:
- no need to call set_recommended_min_free_kbytes() from
late_initcall() -- start_khugepaged() calls it;
- no need to call set_recommended_min_free_kbytes() from
start_khugepaged() if khugepaged is not started;
- there isn't much point in running start_khugepaged() if we've just
set transparent_hugepage_flags to zero;
- start_khugepaged() is misnamed -- it also used to stop the thread;
Signed-off-by: Kirill A. Shutemov <[email protected]>
Cc: David Rientjes <[email protected]>
Cc: Andrea Arcangeli <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Most-used page->mapping helper -- page_mapping() -- has already uninlined.
Let's uninline also page_rmapping() and page_anon_vma(). It saves us
depending on configuration around 400 bytes in text:
text data bss dec hex filename
660318 99254 410000 1169572 11d8a4 mm/built-in.o-before
659854 99254 410000 1169108 11d6d4 mm/built-in.o
I also tried to make code a bit more clean.
[[email protected]: coding-style fixes]
Signed-off-by: Kirill A. Shutemov <[email protected]>
Cc: Christoph Lameter <[email protected]>
Cc: Konstantin Khlebnikov <[email protected]>
Cc: Rik van Riel <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Add trace events for cma_alloc() and cma_release().
The cma_alloc tracepoint is used both for successful and failed allocations,
in case of allocation failure pfn=-1UL is stored and printed.
Signed-off-by: Stefan Strogin <[email protected]>
Cc: Ingo Molnar <[email protected]>
Cc: Steven Rostedt <[email protected]>
Cc: Joonsoo Kim <[email protected]>
Cc: Michal Nazarewicz <[email protected]>
Cc: Marek Szyprowski <[email protected]>
Cc: Laurent Pinchart <[email protected]>
Cc: Thierry Reding <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Flip the flag test so that it is the simplest. No functional change, just
a small readability improvement:
No code changed:
# arch/x86/kernel/sys_x86_64.o:
text data bss dec hex filename
1551 24 0 1575 627 sys_x86_64.o.before
1551 24 0 1575 627 sys_x86_64.o.after
md5:
70708d1b1ad35cc891118a69dc1a63f9 sys_x86_64.o.before.asm
70708d1b1ad35cc891118a69dc1a63f9 sys_x86_64.o.after.asm
Signed-off-by: Borislav Petkov <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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memblock_reserve() calls memblock_reserve_region() which prints debugging
information if 'memblock=debug' was passed on the command line. This
patch adds the same behaviour, but for memblock_add function().
[[email protected]: s/memblock_memory/memblock_add/ in message]
Signed-off-by: Alexander Kuleshov <[email protected]>
Cc: Martin Schwidefsky <[email protected]>
Cc: Philipp Hachtmann <[email protected]>
Cc: Fabian Frederick <[email protected]>
Cc: Catalin Marinas <[email protected]>
Cc: Emil Medve <[email protected]>
Cc: Akinobu Mita <[email protected]>
Cc: Tang Chen <[email protected]>
Cc: Tony Luck <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Now we have an easy access to hugepages' activeness, so existing helpers to
get the information can be cleaned up.
[[email protected]: s/PageHugeActive/page_huge_active/]
Signed-off-by: Naoya Horiguchi <[email protected]>
Cc: Hugh Dickins <[email protected]>
Reviewed-by: Michal Hocko <[email protected]>
Cc: Mel Gorman <[email protected]>
Cc: Johannes Weiner <[email protected]>
Cc: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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We are not safe from calling isolate_huge_page() on a hugepage
concurrently, which can make the victim hugepage in invalid state and
results in BUG_ON().
The root problem of this is that we don't have any information on struct
page (so easily accessible) about hugepages' activeness. Note that
hugepages' activeness means just being linked to
hstate->hugepage_activelist, which is not the same as normal pages'
activeness represented by PageActive flag.
Normal pages are isolated by isolate_lru_page() which prechecks PageLRU
before isolation, so let's do similarly for hugetlb with a new
paeg_huge_active().
set/clear_page_huge_active() should be called within hugetlb_lock. But
hugetlb_cow() and hugetlb_no_page() don't do this, being justified because
in these functions set_page_huge_active() is called right after the
hugepage is allocated and no other thread tries to isolate it.
[[email protected]: s/PageHugeActive/page_huge_active/, make it return bool]
[[email protected]: set_page_huge_active() can be static]
Signed-off-by: Naoya Horiguchi <[email protected]>
Cc: Hugh Dickins <[email protected]>
Reviewed-by: Michal Hocko <[email protected]>
Cc: Mel Gorman <[email protected]>
Cc: Johannes Weiner <[email protected]>
Cc: David Rientjes <[email protected]>
Signed-off-by: Fengguang Wu <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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__put_compound_page() calls __page_cache_release() to do some freeing
work, but it's obviously for thps, not for hugetlb. We don't care because
PageLRU is always cleared and page->mem_cgroup is always NULL for hugetlb.
But it's not correct and has potential risks, so let's make it
conditional.
Signed-off-by: Naoya Horiguchi <[email protected]>
Cc: Hugh Dickins <[email protected]>
Reviewed-by: Michal Hocko <[email protected]>
Cc: Mel Gorman <[email protected]>
Cc: Johannes Weiner <[email protected]>
Cc: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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The creators of the C language gave us the while keyword. Let's use
that instead of synthesizing it from if+goto.
Made possible by 6597d783397a ("mm/mmap.c: replace find_vma_prepare()
with clearer find_vma_links()").
[[email protected]: fix 80-col overflows]
Signed-off-by: Rasmus Villemoes <[email protected]>
Cc: "Kirill A. Shutemov" <[email protected]>
Cc: Sasha Levin <[email protected]>
Cc: Cyrill Gorcunov <[email protected]>
Cc: Roman Gushchin <[email protected]>
Cc: Hugh Dickins <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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When MAP_HUGETLB memory is unmapped, the length must be hugepage aligned,
otherwise it fails with -EINVAL.
All tests currently behave correctly, but it's better to explcitly test
the return value for completeness and document the requirement, especially
if users copy map_hugetlb.c as a sample implementation.
Signed-off-by: David Rientjes <[email protected]>
Cc: Jonathan Corbet <[email protected]>
Cc: Davide Libenzi <[email protected]>
Cc: Luiz Capitulino <[email protected]>
Cc: Shuah Khan <[email protected]>
Cc: Hugh Dickins <[email protected]>
Cc: Andrea Arcangeli <[email protected]>
Cc: Joern Engel <[email protected]>
Cc: Jianguo Wu <[email protected]>
Cc: Eric B Munson <[email protected]>
Acked-by: Michael Ellerman <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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munmap(2) of hugetlb memory requires a length that is hugepage aligned,
otherwise it may fail. Add this to the documentation.
This also cleans up the documentation and separates it into logical units:
one part refers to MAP_HUGETLB and another part refers to requirements for
shared memory segments.
Signed-off-by: David Rientjes <[email protected]>
Cc: Jonathan Corbet <[email protected]>
Cc: Davide Libenzi <[email protected]>
Cc: Luiz Capitulino <[email protected]>
Cc: Shuah Khan <[email protected]>
Acked-by: Hugh Dickins <[email protected]>
Cc: Andrea Arcangeli <[email protected]>
Cc: Joern Engel <[email protected]>
Cc: Jianguo Wu <[email protected]>
Cc: Eric B Munson <[email protected]>
Cc: Michael Ellerman <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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set_recommended_min_free_kbytes() adjusts zone water marks to be suitable
for khugepaged. We avoid doing this if khugepaged is disabled, but don't
catch the case when khugepaged is failed to start.
Let's address this by checking khugepaged_thread instead of
khugepaged_enabled() in set_recommended_min_free_kbytes().
It's NULL if the kernel thread is stopped or failed to start.
Signed-off-by: Kirill A. Shutemov <[email protected]>
Cc: David Rientjes <[email protected]>
Cc: Andrea Arcangeli <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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We miss error-handling in few cases hugepage_init(). Let's fix that.
Signed-off-by: Kirill A. Shutemov <[email protected]>
Cc: Andrea Arcangeli <[email protected]>
Acked-by: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Mempools keep elements in a reserved pool for contexts in which allocation
may not be possible. When an element is allocated from the reserved pool,
its memory contents is the same as when it was added to the reserved pool.
Because of this, elements lack any free poisoning to detect use-after-free
errors.
This patch adds free poisoning for elements backed by the slab allocator.
This is possible because the mempool layer knows the object size of each
element.
When an element is added to the reserved pool, it is poisoned with
POISON_FREE. When it is removed from the reserved pool, the contents are
checked for POISON_FREE. If there is a mismatch, a warning is emitted to
the kernel log.
This is only effective for configs with CONFIG_DEBUG_SLAB or
CONFIG_SLUB_DEBUG_ON.
[[email protected]: use '%zu' for printing 'size_t' variable]
[[email protected]: add missing include]
Signed-off-by: David Rientjes <[email protected]>
Cc: Dave Kleikamp <[email protected]>
Cc: Christoph Hellwig <[email protected]>
Cc: Sebastian Ott <[email protected]>
Cc: Mikulas Patocka <[email protected]>
Cc: Catalin Marinas <[email protected]>
Signed-off-by: Fabio Estevam <[email protected]>
Signed-off-by: Arnd Bergmann <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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All occurrences of mempools based on slab caches with object constructors
have been removed from the tree, so disallow creating them.
We can only dereference mem->ctor in mm/mempool.c without including
mm/slab.h in include/linux/mempool.h. So simply note the restriction,
just like the comment restricting usage of __GFP_ZERO, and warn on kernels
with CONFIG_DEBUG_VM() if such a mempool is allocated from.
We don't want to incur this check on every element allocation, so use
VM_BUG_ON().
Signed-off-by: David Rientjes <[email protected]>
Cc: Dave Kleikamp <[email protected]>
Cc: Christoph Hellwig <[email protected]>
Cc: Sebastian Ott <[email protected]>
Cc: Mikulas Patocka <[email protected]>
Cc: Catalin Marinas <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Mempools based on slab caches with object constructors are risky because
element allocation can happen either from the slab cache itself, meaning
the constructor is properly called before returning, or from the mempool
reserve pool, meaning the constructor is not called before returning,
depending on the allocation context.
For this reason, we should disallow creating mempools based on slab caches
that have object constructors. Callers of mempool_alloc() will be
responsible for properly initializing the returned element.
Then, it doesn't matter if the element came from the slab cache or the
mempool reserved pool.
The only occurrence of a mempool being based on a slab cache with an
object constructor in the tree is in fs/jfs/jfs_metapage.c. Remove it and
properly initialize the element in alloc_metapage().
At the same time, META_free is never used, so remove it as well.
Signed-off-by: David Rientjes <[email protected]>
Acked-by: Dave Kleikamp <[email protected]>
Cc: Christoph Hellwig <[email protected]>
Cc: Sebastian Ott <[email protected]>
Cc: Mikulas Patocka <[email protected]>
Cc: Catalin Marinas <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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We converted some of the usages of ACCESS_ONCE to READ_ONCE in the mm/
tree since it doesn't work reliably on non-scalar types.
This patch removes the rest of the usages of ACCESS_ONCE, and use the new
READ_ONCE API for the read accesses. This makes things cleaner, instead
of using separate/multiple sets of APIs.
Signed-off-by: Jason Low <[email protected]>
Acked-by: Michal Hocko <[email protected]>
Acked-by: Davidlohr Bueso <[email protected]>
Acked-by: Rik van Riel <[email protected]>
Reviewed-by: Christian Borntraeger <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Commit 38c5ce936a08 ("mm/gup: Replace ACCESS_ONCE with READ_ONCE")
converted ACCESS_ONCE usage in gup_pmd_range() to READ_ONCE, since
ACCESS_ONCE doesn't work reliably on non-scalar types.
This patch also fixes the other ACCESS_ONCE usages in gup_pte_range()
and __get_user_pages_fast() in mm/gup.c
Signed-off-by: Jason Low <[email protected]>
Acked-by: Michal Hocko <[email protected]>
Acked-by: Davidlohr Bueso <[email protected]>
Acked-by: Rik van Riel <[email protected]>
Reviewed-by: Christian Borntraeger <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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As suggested by Kirill the "goto"s in vma_to_resize aren't necessary, just
change them to explicit return.
Signed-off-by: Derek Che <[email protected]>
Suggested-by: "Kirill A. Shutemov" <[email protected]>
Acked-by: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Recently I straced bash behavior in this dd zero pipe to read test, in
part of testing under vm.overcommit_memory=2 (OVERCOMMIT_NEVER mode):
# dd if=/dev/zero | read x
The bash sub shell is calling mremap to reallocate more and more memory
untill it finally failed -ENOMEM (I expect), or to be killed by system OOM
killer (which should not happen under OVERCOMMIT_NEVER mode); But the
mremap system call actually failed of -EFAULT, which is a surprise to me,
I think it's supposed to be -ENOMEM? then I wrote this piece of C code
testing confirmed it: https://gist.github.com/crquan/326bde37e1ddda8effe5
$ ./remap
allocated one page @0x7f686bf71000, (PAGE_SIZE: 4096)
grabbed 7680512000 bytes of memory (1875125 pages) @ 00007f6690993000.
mremap failed Bad address (14).
The -EFAULT comes from the branch of security_vm_enough_memory_mm failure,
underlyingly it calls __vm_enough_memory which returns only 0 for success
or -ENOMEM; So why vma_to_resize needs to return -EFAULT in this case?
this sounds like a mistake to me.
Some more digging into git history:
1) Before commit 119f657c7 ("RLIMIT_AS checking fix") in May 1 2005
(pre 2.6.12 days) it was returning -ENOMEM for this failure;
2) but commit 119f657c7 ("untangling do_mremap(), part 1") changed it
accidentally, to what ever is preserved in local ret, which happened to
be -EFAULT, in a previous assignment;
3) then in commit 54f5de709 code refactoring, it's explicitly returning
-EFAULT, should be wrong.
Signed-off-by: Derek Che <[email protected]>
Acked-by: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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In original implementation of vm_map_ram made by Nick Piggin there were
two bitmaps: alloc_map and dirty_map. None of them were used as supposed
to be: finding a suitable free hole for next allocation in block.
vm_map_ram allocates space sequentially in block and on free call marks
pages as dirty, so freed space can't be reused anymore.
Actually it would be very interesting to know the real meaning of those
bitmaps, maybe implementation was incomplete, etc.
But long time ago Zhang Yanfei removed alloc_map by these two commits:
mm/vmalloc.c: remove dead code in vb_alloc
3fcd76e8028e0be37b02a2002b4f56755daeda06
mm/vmalloc.c: remove alloc_map from vmap_block
b8e748b6c32999f221ea4786557b8e7e6c4e4e7a
In this patch I replaced dirty_map with two range variables: dirty min and
max. These variables store minimum and maximum position of dirty space in
a block, since we need only to know the dirty range, not exact position of
dirty pages.
Why it was made? Several reasons: at first glance it seems that
vm_map_ram allocator concerns about fragmentation thus it uses bitmaps for
finding free hole, but it is not true. To avoid complexity seems it is
better to use something simple, like min or max range values. Secondly,
code also becomes simpler, without iteration over bitmap, just comparing
values in min and max macros. Thirdly, bitmap occupies up to 1024 bits
(4MB is a max size of a block). Here I replaced the whole bitmap with two
longs.
Finally vm_unmap_aliases should be slightly faster and the whole
vmap_block structure occupies less memory.
Signed-off-by: Roman Pen <[email protected]>
Cc: Zhang Yanfei <[email protected]>
Cc: Eric Dumazet <[email protected]>
Acked-by: Joonsoo Kim <[email protected]>
Cc: David Rientjes <[email protected]>
Cc: WANG Chao <[email protected]>
Cc: Fabian Frederick <[email protected]>
Cc: Christoph Lameter <[email protected]>
Cc: Gioh Kim <[email protected]>
Cc: Rob Jones <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Previous implementation allocates new vmap block and repeats search of a
free block from the very beginning, iterating over the CPU free list.
Why it can be better??
1. Allocation can happen on one CPU, but search can be done on another CPU.
In worst case we preallocate amount of vmap blocks which is equal to
CPU number on the system.
2. In previous patch I added newly allocated block to the tail of free list
to avoid soon exhaustion of virtual space and give a chance to occupy
blocks which were allocated long time ago. Thus to find newly allocated
block all the search sequence should be repeated, seems it is not efficient.
In this patch newly allocated block is occupied right away, address of
virtual space is returned to the caller, so there is no any need to repeat
the search sequence, allocation job is done.
Signed-off-by: Roman Pen <[email protected]>
Cc: Andrew Morton <[email protected]>
Cc: Eric Dumazet <[email protected]>
Acked-by: Joonsoo Kim <[email protected]>
Cc: David Rientjes <[email protected]>
Cc: WANG Chao <[email protected]>
Cc: Fabian Frederick <[email protected]>
Cc: Christoph Lameter <[email protected]>
Cc: Gioh Kim <[email protected]>
Cc: Rob Jones <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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allocator
Recently I came across high fragmentation of vm_map_ram allocator:
vmap_block has free space, but still new blocks continue to appear.
Further investigation showed that certain mapping/unmapping sequences
can exhaust vmalloc space. On small 32bit systems that's not a big
problem, cause purging will be called soon on a first allocation failure
(alloc_vmap_area), but on 64bit machines, e.g. x86_64 has 45 bits of
vmalloc space, that can be a disaster.
1) I came up with a simple allocation sequence, which exhausts virtual
space very quickly:
while (iters) {
/* Map/unmap big chunk */
vaddr = vm_map_ram(pages, 16, -1, PAGE_KERNEL);
vm_unmap_ram(vaddr, 16);
/* Map/unmap small chunks.
*
* -1 for hole, which should be left at the end of each block
* to keep it partially used, with some free space available */
for (i = 0; i < (VMAP_BBMAP_BITS - 16) / 8 - 1; i++) {
vaddr = vm_map_ram(pages, 8, -1, PAGE_KERNEL);
vm_unmap_ram(vaddr, 8);
}
}
The idea behind is simple:
1. We have to map a big chunk, e.g. 16 pages.
2. Then we have to occupy the remaining space with smaller chunks, i.e.
8 pages. At the end small hole should remain to keep block in free list,
but do not let big chunk to occupy remaining space.
3. Goto 1 - allocation request of 16 pages can't be completed (only 8 slots
are left free in the block in the #2 step), new block will be allocated,
all further requests will lay into newly allocated block.
To have some measurement numbers for all further tests I setup ftrace and
enabled 4 basic calls in a function profile:
echo vm_map_ram > /sys/kernel/debug/tracing/set_ftrace_filter;
echo alloc_vmap_area >> /sys/kernel/debug/tracing/set_ftrace_filter;
echo vm_unmap_ram >> /sys/kernel/debug/tracing/set_ftrace_filter;
echo free_vmap_block >> /sys/kernel/debug/tracing/set_ftrace_filter;
So for this scenario I got these results:
BEFORE (all new blocks are put to the head of a free list)
# cat /sys/kernel/debug/tracing/trace_stat/function0
Function Hit Time Avg s^2
-------- --- ---- --- ---
vm_map_ram 126000 30683.30 us 0.243 us 30819.36 us
vm_unmap_ram 126000 22003.24 us 0.174 us 340.886 us
alloc_vmap_area 1000 4132.065 us 4.132 us 0.903 us
AFTER (all new blocks are put to the tail of a free list)
# cat /sys/kernel/debug/tracing/trace_stat/function0
Function Hit Time Avg s^2
-------- --- ---- --- ---
vm_map_ram 126000 28713.13 us 0.227 us 24944.70 us
vm_unmap_ram 126000 20403.96 us 0.161 us 1429.872 us
alloc_vmap_area 993 3916.795 us 3.944 us 29.370 us
free_vmap_block 992 654.157 us 0.659 us 1.273 us
SUMMARY:
The most interesting numbers in those tables are numbers of block
allocations and deallocations: alloc_vmap_area and free_vmap_block
calls, which show that before the change blocks were not freed, and
virtual space and physical memory (vmap_block structure allocations,
etc) were consumed.
Average time which were spent in vm_map_ram/vm_unmap_ram became slightly
better. That can be explained with a reasonable amount of blocks in a
free list, which we need to iterate to find a suitable free block.
2) Another scenario is a random allocation:
while (iters) {
/* Randomly take number from a range [1..32/64] */
nr = rand(1, VMAP_MAX_ALLOC);
vaddr = vm_map_ram(pages, nr, -1, PAGE_KERNEL);
vm_unmap_ram(vaddr, nr);
}
I chose mersenne twister PRNG to generate persistent random state to
guarantee that both runs have the same random sequence. For each
vm_map_ram call random number from [1..32/64] was taken to represent
amount of pages which I do map.
I did 10'000 vm_map_ram calls and got these two tables:
BEFORE (all new blocks are put to the head of a free list)
# cat /sys/kernel/debug/tracing/trace_stat/function0
Function Hit Time Avg s^2
-------- --- ---- --- ---
vm_map_ram 10000 10170.01 us 1.017 us 993.609 us
vm_unmap_ram 10000 5321.823 us 0.532 us 59.789 us
alloc_vmap_area 420 2150.239 us 5.119 us 3.307 us
free_vmap_block 37 159.587 us 4.313 us 134.344 us
AFTER (all new blocks are put to the tail of a free list)
# cat /sys/kernel/debug/tracing/trace_stat/function0
Function Hit Time Avg s^2
-------- --- ---- --- ---
vm_map_ram 10000 7745.637 us 0.774 us 395.229 us
vm_unmap_ram 10000 5460.573 us 0.546 us 67.187 us
alloc_vmap_area 414 2201.650 us 5.317 us 5.591 us
free_vmap_block 412 574.421 us 1.394 us 15.138 us
SUMMARY:
'BEFORE' table shows, that 420 blocks were allocated and only 37 were
freed. Remained 383 blocks are still in a free list, consuming virtual
space and physical memory.
'AFTER' table shows, that 414 blocks were allocated and 412 were really
freed. 2 blocks remained in a free list.
So fragmentation was dramatically reduced. Why? Because when we put
newly allocated block to the head, all further requests will occupy new
block, regardless remained space in other blocks. In this scenario all
requests come randomly. Eventually remained free space will be less
than requested size, free list will be iterated and it is possible that
nothing will be found there - finally new block will be created. So
exhaustion in random scenario happens for the maximum possible
allocation size: 32 pages for 32-bit system and 64 pages for 64-bit
system.
Also average cost of vm_map_ram was reduced from 1.017 us to 0.774 us.
Again this can be explained by iteration through smaller list of free
blocks.
3) Next simple scenario is a sequential allocation, when the allocation
order is increased for each block. This scenario forces allocator to
reach maximum amount of partially free blocks in a free list:
while (iters) {
/* Populate free list with blocks with remaining space */
for (order = 0; order <= ilog2(VMAP_MAX_ALLOC); order++) {
nr = VMAP_BBMAP_BITS / (1 << order);
/* Leave a hole */
nr -= 1;
for (i = 0; i < nr; i++) {
vaddr = vm_map_ram(pages, (1 << order), -1, PAGE_KERNEL);
vm_unmap_ram(vaddr, (1 << order));
}
/* Completely occupy blocks from a free list */
for (order = 0; order <= ilog2(VMAP_MAX_ALLOC); order++) {
vaddr = vm_map_ram(pages, (1 << order), -1, PAGE_KERNEL);
vm_unmap_ram(vaddr, (1 << order));
}
}
Results which I got:
BEFORE (all new blocks are put to the head of a free list)
# cat /sys/kernel/debug/tracing/trace_stat/function0
Function Hit Time Avg s^2
-------- --- ---- --- ---
vm_map_ram 2032000 399545.2 us 0.196 us 467123.7 us
vm_unmap_ram 2032000 363225.7 us 0.178 us 111405.9 us
alloc_vmap_area 7001 30627.76 us 4.374 us 495.755 us
free_vmap_block 6993 7011.685 us 1.002 us 159.090 us
AFTER (all new blocks are put to the tail of a free list)
# cat /sys/kernel/debug/tracing/trace_stat/function0
Function Hit Time Avg s^2
-------- --- ---- --- ---
vm_map_ram 2032000 394259.7 us 0.194 us 589395.9 us
vm_unmap_ram 2032000 292500.7 us 0.143 us 94181.08 us
alloc_vmap_area 7000 31103.11 us 4.443 us 703.225 us
free_vmap_block 7000 6750.844 us 0.964 us 119.112 us
SUMMARY:
No surprises here, almost all numbers are the same.
Fixing this fragmentation problem I also did some improvements in a
allocation logic of a new vmap block: occupy block immediately and get
rid of extra search in a free list.
Also I replaced dirty bitmap with min/max dirty range values to make the
logic simpler and slightly faster, since two longs comparison costs
less, than loop thru bitmap.
This patchset raises several questions:
Q: Think the problem you comments is already known so that I wrote comments
about it as "it could consume lots of address space through fragmentation".
Could you tell me about your situation and reason why it should be avoided?
Gioh Kim
A: Indeed, there was a commit 364376383 which adds explicit comment about
fragmentation. But fragmentation which is described in this comment caused
by mixing of long-lived and short-lived objects, when a whole block is pinned
in memory because some page slots are still in use. But here I am talking
about blocks which are free, nobody uses them, and allocator keeps them alive
forever, continuously allocating new blocks.
Q: I think that if you put newly allocated block to the tail of a free
list, below example would results in enormous performance degradation.
new block: 1MB (256 pages)
while (iters--) {
vm_map_ram(3 or something else not dividable for 256) * 85
vm_unmap_ram(3) * 85
}
On every iteration, it needs newly allocated block and it is put to the
tail of a free list so finding it consumes large amount of time.
Joonsoo Kim
A: Second patch in current patchset gets rid of extra search in a free list,
so new block will be immediately occupied..
Also, the scenario above is impossible, cause vm_map_ram allocates virtual
range in orders, i.e. 2^n. I.e. passing 3 to vm_map_ram you will allocate
4 slots in a block and 256 slots (capacity of a block) of course dividable
on 4, so block will be completely occupied.
But there is a worst case which we can achieve: each free block has a hole
equal to order size.
The maximum size of allocation is 64 pages for 64-bit system
(if you try to map more, original alloc_vmap_area will be called).
So the maximum order is 6. That means that worst case, before allocator
makes a decision to allocate a new block, is to iterate 7 blocks:
HEAD
1st block - has 1 page slot free (order 0)
2nd block - has 2 page slots free (order 1)
3rd block - has 4 page slots free (order 2)
4th block - has 8 page slots free (order 3)
5th block - has 16 page slots free (order 4)
6th block - has 32 page slots free (order 5)
7th block - has 64 page slots free (order 6)
TAIL
So the worst scenario on 64-bit system is that each CPU queue can have 7
blocks in a free list.
This can happen only and only if you allocate blocks increasing the order.
(as I did in the function written in the comment of the first patch)
This is weird and rare case, but still it is possible. Afterwards you will
get 7 blocks in a list.
All further requests should be placed in a newly allocated block or some
free slots should be found in a free list.
Seems it does not look dramatically awful.
This patch (of 3):
If suitable block can't be found, new block is allocated and put into a
head of a free list, so on next iteration this new block will be found
first.
That's bad, because old blocks in a free list will not get a chance to be
fully used, thus fragmentation will grow.
Let's consider this simple example:
#1 We have one block in a free list which is partially used, and where only
one page is free:
HEAD |xxxxxxxxx-| TAIL
^
free space for 1 page, order 0
#2 New allocation request of order 1 (2 pages) comes, new block is allocated
since we do not have free space to complete this request. New block is put
into a head of a free list:
HEAD |----------|xxxxxxxxx-| TAIL
#3 Two pages were occupied in a new found block:
HEAD |xx--------|xxxxxxxxx-| TAIL
^
two pages mapped here
#4 New allocation request of order 0 (1 page) comes. Block, which was created
on #2 step, is located at the beginning of a free list, so it will be found
first:
HEAD |xxX-------|xxxxxxxxx-| TAIL
^ ^
page mapped here, but better to use this hole
It is obvious, that it is better to complete request of #4 step using the
old block, where free space is left, because in other case fragmentation
will be highly increased.
But fragmentation is not only the case. The worst thing is that I can
easily create scenario, when the whole vmalloc space is exhausted by
blocks, which are not used, but already dirty and have several free pages.
Let's consider this function which execution should be pinned to one CPU:
static void exhaust_virtual_space(struct page *pages[16], int iters)
{
/* Firstly we have to map a big chunk, e.g. 16 pages.
* Then we have to occupy the remaining space with smaller
* chunks, i.e. 8 pages. At the end small hole should remain.
* So at the end of our allocation sequence block looks like
* this:
* XX big chunk
* |XXxxxxxxx-| x small chunk
* - hole, which is enough for a small chunk,
* but is not enough for a big chunk
*/
while (iters--) {
int i;
void *vaddr;
/* Map/unmap big chunk */
vaddr = vm_map_ram(pages, 16, -1, PAGE_KERNEL);
vm_unmap_ram(vaddr, 16);
/* Map/unmap small chunks.
*
* -1 for hole, which should be left at the end of each block
* to keep it partially used, with some free space available */
for (i = 0; i < (VMAP_BBMAP_BITS - 16) / 8 - 1; i++) {
vaddr = vm_map_ram(pages, 8, -1, PAGE_KERNEL);
vm_unmap_ram(vaddr, 8);
}
}
}
On every iteration new block (1MB of vm area in my case) will be
allocated and then will be occupied, without attempt to resolve small
allocation request using previously allocated blocks in a free list.
In case of random allocation (size should be randomly taken from the
range [1..64] in 64-bit case or [1..32] in 32-bit case) situation is the
same: new blocks continue to appear if maximum possible allocation size
(32 or 64) passed to the allocator, because all remaining blocks in a
free list do not have enough free space to complete this allocation
request.
In summary if new blocks are put into the head of a free list eventually
virtual space will be exhausted.
In current patch I simply put newly allocated block to the tail of a
free list, thus reduce fragmentation, giving a chance to resolve
allocation request using older blocks with possible holes left.
Signed-off-by: Roman Pen <[email protected]>
Cc: Eric Dumazet <[email protected]>
Acked-by: Joonsoo Kim <[email protected]>
Cc: David Rientjes <[email protected]>
Cc: WANG Chao <[email protected]>
Cc: Fabian Frederick <[email protected]>
Cc: Christoph Lameter <[email protected]>
Cc: Gioh Kim <[email protected]>
Cc: Rob Jones <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
Add min_size mount option to the hugetlbfs documentation. Also, add the
missing pagesize option and mention that size can be specified as bytes or
a percentage of huge page pool.
Signed-off-by: Mike Kravetz <[email protected]>
Cc: Davidlohr Bueso <[email protected]>
Cc: Aneesh Kumar <[email protected]>
Cc: Joonsoo Kim <[email protected]>
Cc: Andi Kleen <[email protected]>
Cc: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
Make 'min_size=<value>' be an option when mounting a hugetlbfs. This
option takes the same value as the 'size' option. min_size can be
specified without specifying size. If both are specified, min_size must
be less that or equal to size else the mount will fail. If min_size is
specified, then at mount time an attempt is made to reserve min_size
pages. If the reservation fails, the mount fails. At umount time, the
reserved pages are released.
Signed-off-by: Mike Kravetz <[email protected]>
Cc: Davidlohr Bueso <[email protected]>
Cc: Aneesh Kumar <[email protected]>
Cc: Joonsoo Kim <[email protected]>
Cc: Andi Kleen <[email protected]>
Cc: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
The same routines that perform subpool maximum size accounting
hugepage_subpool_get/put_pages() are modified to also perform minimum size
accounting. When a delta value is passed to these routines, calculate how
global reservations must be adjusted to maintain the subpool minimum size.
The routines now return this global reserve count adjustment. This
global reserve count adjustment is then passed to the global accounting
routine hugetlb_acct_memory().
Signed-off-by: Mike Kravetz <[email protected]>
Cc: Davidlohr Bueso <[email protected]>
Cc: Aneesh Kumar <[email protected]>
Cc: Joonsoo Kim <[email protected]>
Cc: Andi Kleen <[email protected]>
Cc: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
hugetlbfs allocates huge pages from the global pool as needed. Even if
the global pool contains a sufficient number pages for the filesystem size
at mount time, those global pages could be grabbed for some other use. As
a result, filesystem huge page allocations may fail due to lack of pages.
Applications such as a database want to use huge pages for performance
reasons. hugetlbfs filesystem semantics with ownership and modes work
well to manage access to a pool of huge pages. However, the application
would like some reasonable assurance that allocations will not fail due to
a lack of huge pages. At application startup time, the application would
like to configure itself to use a specific number of huge pages. Before
starting, the application can check to make sure that enough huge pages
exist in the system global pools. However, there are no guarantees that
those pages will be available when needed by the application. What the
application wants is exclusive use of a subset of huge pages.
Add a new hugetlbfs mount option 'min_size=<value>' to indicate that the
specified number of pages will be available for use by the filesystem. At
mount time, this number of huge pages will be reserved for exclusive use
of the filesystem. If there is not a sufficient number of free pages, the
mount will fail. As pages are allocated to and freeed from the
filesystem, the number of reserved pages is adjusted so that the specified
minimum is maintained.
This patch (of 4):
Add a field to the subpool structure to indicate the minimimum number of
huge pages to always be used by this subpool. This minimum count includes
allocated pages as well as reserved pages. If the minimum number of pages
for the subpool have not been allocated, pages are reserved up to this
minimum. An additional field (rsv_hpages) is used to track the number of
pages reserved to meet this minimum size. The hstate pointer in the
subpool is convenient to have when reserving and unreserving the pages.
Signed-off-by: Mike Kravetz <[email protected]>
Cc: Davidlohr Bueso <[email protected]>
Cc: Aneesh Kumar <[email protected]>
Cc: Joonsoo Kim <[email protected]>
Cc: Andi Kleen <[email protected]>
Cc: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
When the compaction is activated via /proc/sys/vm/compact_memory it would
better scan the whole zone. And some platforms, for instance ARM, have
the start_pfn of a zone at zero. Therefore the first try to compact via
/proc doesn't work. It needs to reset the compaction scanner position
first.
Signed-off-by: Gioh Kim <[email protected]>
Acked-by: Vlastimil Babka <[email protected]>
Acked-by: David Rientjes <[email protected]>
Cc: Joonsoo Kim <[email protected]>
Cc: Mel Gorman <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
memcg currently uses hardcoded GFP_TRANSHUGE gfp flags for all THP
charges. THP allocations, however, might be using different flags
depending on /sys/kernel/mm/transparent_hugepage/{,khugepaged/}defrag and
the current allocation context.
The primary difference is that defrag configured to "madvise" value will
clear __GFP_WAIT flag from the core gfp mask to make the allocation
lighter for all mappings which are not backed by VM_HUGEPAGE vmas. If
memcg charge path ignores this fact we will get light allocation but the a
potential memcg reclaim would kill the whole point of the configuration.
Fix the mismatch by providing the same gfp mask used for the allocation to
the charge functions. This is quite easy for all paths except for
hugepaged kernel thread with !CONFIG_NUMA which is doing a pre-allocation
long before the allocated page is used in collapse_huge_page via
khugepaged_alloc_page. To prevent from cluttering the whole code path
from khugepaged_do_scan we simply return the current flags as per
khugepaged_defrag() value which might have changed since the
preallocation. If somebody changed the value of the knob we would charge
differently but this shouldn't happen often and it is definitely not
critical because it would only lead to a reduced success rate of one-off
THP promotion.
[[email protected]: fix weird code layout while we're there]
[[email protected]: clean up around alloc_hugepage_gfpmask()]
Signed-off-by: Michal Hocko <[email protected]>
Acked-by: Vlastimil Babka <[email protected]>
Cc: Johannes Weiner <[email protected]>
Acked-by: David Rientjes <[email protected]>
Signed-off-by: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
"deactivate_page" was created for file invalidation so it has too
specific logic for file-backed pages. So, let's change the name of the
function and date to a file-specific one and yield the generic name.
Signed-off-by: Minchan Kim <[email protected]>
Cc: Michal Hocko <[email protected]>
Cc: Johannes Weiner <[email protected]>
Cc: Mel Gorman <[email protected]>
Cc: Rik van Riel <[email protected]>
Cc: Shaohua Li <[email protected]>
Cc: Wang, Yalin <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
compaction and the unevictable LRU
The memory compaction code uses the migration code to do most of the
work in compaction. However, the compaction code interacts with the
unevictable LRU differently than migration code and this difference
should be noted in the documentation.
[[email protected]: identify /proc/sys/vm/compact_unevictable directly]
Signed-off-by: Eric B Munson <[email protected]>
Cc: Michal Hocko <[email protected]>
Cc: Vlastimil Babka <[email protected]>
Cc: Christoph Lameter <[email protected]>
Cc: David Rientjes <[email protected]>
Cc: Rik van Riel <[email protected]>
Cc: Thomas Gleixner <[email protected]>
Cc: Peter Zijlstra <[email protected]>
Cc: Mel Gorman <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
Currently, pages which are marked as unevictable are protected from
compaction, but not from other types of migration. The POSIX real time
extension explicitly states that mlock() will prevent a major page
fault, but the spirit of this is that mlock() should give a process the
ability to control sources of latency, including minor page faults.
However, the mlock manpage only explicitly says that a locked page will
not be written to swap and this can cause some confusion. The
compaction code today does not give a developer who wants to avoid swap
but wants to have large contiguous areas available any method to achieve
this state. This patch introduces a sysctl for controlling compaction
behavior with respect to the unevictable lru. Users who demand no page
faults after a page is present can set compact_unevictable_allowed to 0
and users who need the large contiguous areas can enable compaction on
locked memory by leaving the default value of 1.
To illustrate this problem I wrote a quick test program that mmaps a
large number of 1MB files filled with random data. These maps are
created locked and read only. Then every other mmap is unmapped and I
attempt to allocate huge pages to the static huge page pool. When the
compact_unevictable_allowed sysctl is 0, I cannot allocate hugepages
after fragmenting memory. When the value is set to 1, allocations
succeed.
Signed-off-by: Eric B Munson <[email protected]>
Acked-by: Michal Hocko <[email protected]>
Acked-by: Vlastimil Babka <[email protected]>
Acked-by: Christoph Lameter <[email protected]>
Acked-by: David Rientjes <[email protected]>
Acked-by: Rik van Riel <[email protected]>
Cc: Vlastimil Babka <[email protected]>
Cc: Thomas Gleixner <[email protected]>
Cc: Christoph Lameter <[email protected]>
Cc: Peter Zijlstra <[email protected]>
Cc: Mel Gorman <[email protected]>
Cc: David Rientjes <[email protected]>
Cc: Michal Hocko <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
With the page flag sanitization patchset, an invalid usage of
ClearPageReclaim() is detected in set_page_dirty(). This can be called
from __unmap_hugepage_range(), so let's check PageReclaim() before trying
to clear it to avoid the misuse.
Signed-off-by: Naoya Horiguchi <[email protected]>
Acked-by: Kirill A. Shutemov <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
With the page flag sanitization patchset, an invalid usage of
ClearPageSwapCache() is detected in migration_page_copy().
migrate_page_copy() is shared by both normal and hugepage (both thp and
hugetlb) code path, so let's check PageSwapCache() and clear it if it's
set to avoid misuse of the invalid clear operation.
Signed-off-by: Naoya Horiguchi <[email protected]>
Acked-by: Kirill A. Shutemov <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
THP uses tail page refcounting to be able to split huge pages at any time.
Tail page refcounting is not needed for other users of compound pages and
it's harmful because of overhead.
We try to exclude non-THP pages from tail page refcounting using
__compound_tail_refcounted() check. It excludes most common non-THP
compound pages: SL*B and hugetlb, but it doesn't catch rest of __GFP_COMP
users -- drivers.
And it's not only about overhead.
Drivers might want to use compound pages to get refcounting semantics
suitable for mapping high-order pages to userspace. But tail page
refcounting breaks it.
Tail page refcounting uses ->_mapcount in tail pages to store GUP pins on
them. It means GUP pins would affect page_mapcount() for tail pages.
It's not a problem for THP, because it never maps tail pages. But unlike
THP, drivers map parts of compound pages with PTEs and it makes
page_mapcount() be called for tail pages.
In particular, GUP pins would shift PSS up and affect /proc/kpagecount for
such pages. But, I'm not aware about anything which can lead to crash or
other serious misbehaviour.
Since currently all THP pages are anonymous and all drivers pages are not,
we can fix the __compound_tail_refcounted() check by requiring PageAnon()
to enable tail page refcounting.
Signed-off-by: Kirill A. Shutemov <[email protected]>
Acked-by: Hugh Dickins <[email protected]>
Cc: Andrea Arcangeli <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
|
|
Currently we take a naive approach to page flags on compound pages - we
set the flag on the page without consideration if the flag makes sense
for tail page or for compound page in general. This patchset try to
sort this out by defining per-flag policy on what need to be done if
page-flag helper operate on compound page.
The last patch in the patchset also sanitizes usege of page->mapping for
tail pages. We don't define the meaning of page->mapping for tail
pages. Currently it's always NULL, which can be inconsistent with head
page and potentially lead to problems.
For now I caught one case of illegal usage of page flags or ->mapping:
sound subsystem allocates pages with __GFP_COMP and maps them with PTEs.
It leads to setting dirty bit on tail pages and access to tail_page's
->mapping. I don't see any bad behaviour caused by this, but worth
fixing anyway.
This patchset makes more sense if you take my THP refcounting into
account: we will see more compound pages mapped with PTEs and we need to
define behaviour of flags on compound pages to avoid bugs.
This patch (of 16):
We have page-flags helper function declarations/definitions spread over
several header files. Let's consolidate them in <linux/page-flags.h>.
Signed-off-by: Kirill A. Shutemov <[email protected]>
Cc: Andrea Arcangeli <[email protected]>
Acked-by: Hugh Dickins <[email protected]>
Cc: Dave Hansen <[email protected]>
Cc: Mel Gorman <[email protected]>
Cc: Rik van Riel <[email protected]>
Cc: Vlastimil Babka <[email protected]>
Cc: Christoph Lameter <[email protected]>
Cc: Naoya Horiguchi <[email protected]>
Cc: Steve Capper <[email protected]>
Cc: "Aneesh Kumar K.V" <[email protected]>
Cc: Johannes Weiner <[email protected]>
Cc: Michal Hocko <[email protected]>
Cc: Jerome Marchand <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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This cleanup patch moves all strings passed to action_result() into a
singl= e array action_page_type so that a reader can easily find which
kind of actio= n results are possible. And this patch also fixes the
odd lines to be printed out, like "unknown page state page" or "free
buddy, 2nd try page".
[[email protected]: rename messages, per David]
[[email protected]: s/DIRTY_UNEVICTABLE_LRU/CLEAN_UNEVICTABLE_LRU', per Andi]
Signed-off-by: Naoya Horiguchi <[email protected]>
Reviewed-by: Andi Kleen <[email protected]>
Cc: Tony Luck <[email protected]>
Cc: "Xie XiuQi" <[email protected]>
Cc: Steven Rostedt <[email protected]>
Cc: Chen Gong <[email protected]>
Cc: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Low and high watermarks, as they defined in the TODO to the mem_cgroup
struct, have already been implemented by Johannes, so remove the stale
comment.
Signed-off-by: Vladimir Davydov <[email protected]>
Cc: Johannes Weiner <[email protected]>
Acked-by: Michal Hocko <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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mem_cgroup_lookup() is a wrapper around mem_cgroup_from_id(), which
checks that id != 0 before issuing the function call. Today, there is
no point in this additional check apart from optimization, because there
is no css with id <= 0, so that css_from_id, called by
mem_cgroup_from_id, will return NULL for any id <= 0.
Since mem_cgroup_from_id is only called from mem_cgroup_lookup, let us
zap mem_cgroup_lookup, substituting calls to it with mem_cgroup_from_id
and moving the check if id > 0 to css_from_id.
Signed-off-by: Vladimir Davydov <[email protected]>
Acked-by: Michal Hocko <[email protected]>
Cc: Johannes Weiner <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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All callers of zone_movable_is_highmem are under #ifdef CONFIG_HIGHMEM,
so the else branch return 0 is not needed.
Signed-off-by: Zhang Zhen <[email protected]>
Acked-by: David Rientjes <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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Alter 'taks' -> 'task'
Signed-off-by: Yaowei Bai <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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vfs_readdir() was replaced by iterate_dir() in commit 5c0ba4e0762e
("[readdir] introduce iterate_dir() and dir_context").
Signed-off-by: Zhang Zhen <[email protected]>
Cc: Al Viro <[email protected]>
Signed-off-by: Andrew Morton <[email protected]>
Signed-off-by: Linus Torvalds <[email protected]>
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git://git.kernel.org/pub/scm/linux/kernel/git/cooloney/linux-leds
Pull LED subsystem updates from Bryan Wu:
"In this cycle, we merged some fix and update for LED Flash class
driver. Then the core code of LED Flash class driver is in the kernel
now. Moreover, we also got some bug fixes, code cleanup and new
drivers for LED controllers"
* 'for-next' of git://git.kernel.org/pub/scm/linux/kernel/git/cooloney/linux-leds:
leds: Don't treat the LED name as a format string
leds: Use log level warn instead of info when telling about a name clash
leds/led-class: Handle LEDs with the same name
leds: lp8860: Fix typo in MODULE_DESCRIPTION in leds-lp8860.c
leds: lp8501: Fix typo in MODULE_DESCRIPTION in leds-lp8501.c
DT: leds: Add uniqueness requirement for 'label' property.
dt-binding: leds: Add common LED DT bindings macros
leds: add Qualcomm PM8941 WLED driver
leds: add DT binding for Qualcomm PM8941 WLED block
leds: pca963x: Add missing initialiation of struct led_info.flags
leds: flash: Fix the size of sysfs_groups array
Documentation: leds: Add description of LED Flash class extension
leds: flash: document sysfs interface
leds: flash: Remove synchronized flash strobe feature
leds: Introduce devres helper for led_classdev_register
leds: lp8860: make use of devm_gpiod_get_optional
leds: Let the binding document example for leds-gpio follow the gpio bindings
leds: flash: remove stray include directive
leds: leds-pwm: drop one pwm_get_period() call
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git://git.kernel.org/pub/scm/linux/kernel/git/tiwai/sound
Pull sound updates from Takashi Iwai:
"There have been major modernization with the standard bus: in ALSA
sequencer core and HD-audio. Also, HD-audio receives the regmap
support replacing the in-house cache register cache code. These
changes shouldn't impact the existing behavior, but rather
refactoring.
In addition, HD-audio got the code split to a core library part and
the "legacy" driver parts. This is a preliminary work for adapting
the upcoming ASoC HD-audio driver, and the whole transition is still
work in progress, likely finished in 4.1.
Along with them, there are many updates in ASoC area as usual, too:
lots of cleanups, Intel code shuffling, etc.
Here are some highlights:
ALSA core:
- PCM: the audio timestamp / wallclock enhancement
- PCM: fixes in DPCM management
- Fixes / cleanups of user-space control element management
- Sequencer: modernization using the standard bus
HD-audio:
- Modernization using the standard bus
- Regmap support
- Use standard runtime PM for codec power saving
- Widget-path based power-saving for IDT, VIA and Realtek codecs
- Reorganized sysfs entries for each codec object
- More Dell headset support
ASoC:
- Move of jack registration to the card level
- Lots of ASoC cleanups, mainly moving things from the CODEC level to
the card level
- Support for DAPM routes specified by both the machine driver and DT
- Continuing improvements to rcar
- pcm512x enhacements
- Intel platforms updates
- rt5670 updates / fixes
- New platforms / devices: some non-DSP Qualcomm platforms, Google's
Storm platform, Maxmim MAX98925 CODECs and the Ingenic JZ4780 SoC
Misc:
- ice1724: Improved ESI W192M support
- emu10k1: Emu 1010 fixes/enhancement"
* tag 'sound-4.1-rc1' of git://git.kernel.org/pub/scm/linux/kernel/git/tiwai/sound: (411 commits)
ALSA: hda - set GET bit when adding a vendor verb to the codec regmap
ALSA: hda/realtek - Enable the ALC292 dock fixup on the Thinkpad T450
ALSA: hda - Fix another race in runtime PM refcounting
ALSA: hda - Expose codec type sysfs
ALSA: ctl: fix to handle several elements added by one operation for userspace element
ASoC: Intel: fix array_size.cocci warnings
ASoC: n810: Automatically disconnect non-connected pins
ASoC: n810: Consistently pass the card DAPM context to n810_ext_control()
ASoC: davinci-evm: Use card DAPM context to access widgets
ASoC: mop500_ab8500: Use card DAPM context to access widgets
ASoC: wm1133-ev1: Use card DAPM context to access widgets
ASoC: atmel: Improve machine driver compile test coverage
ASoC: atmel: Add dependency to SND_SOC_I2C_AND_SPI where necessary
ALSA: control: Fix a typo of SNDRV_CTL_ELEM_ACCESS_TLV_* with SNDRV_CTL_TLV_OP_*
ALSA: usb-audio: Don't attempt to get Microsoft Lifecam Cinema sample rate
ASoC: rnsd: fix build regression without CONFIG_OF
ALSA: emu10k1: add toggles for E-mu 1010 optical ports
ALSA: ctl: fill identical information to return value when adding userspace elements
ALSA: ctl: fix a bug to return no identical information in info operation for userspace controls
ALSA: ctl: confirm to return all identical information in 'activate' event
...
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Pull file locking related changes from Jeff Layton:
"This set is mostly minor cleanups to the overhaul that went in last
cycle. The other noticeable items are the changes to the lm_get_owner
and lm_put_owner prototypes, and the fact that we no longer need to
use the i_lock to protect the i_flctx pointer"
* tag 'locks-v4.1-1' of git://git.samba.org/jlayton/linux:
locks: use cmpxchg to assign i_flctx pointer
locks: get rid of WE_CAN_BREAK_LSLK_NOW dead code
locks: change lm_get_owner and lm_put_owner prototypes
locks: don't allocate a lock context for an F_UNLCK request
locks: Add lockdep assertion for blocked_lock_lock
locks: remove extraneous IS_POSIX and IS_FLOCK tests
locks: Remove unnecessary IS_POSIX test
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