- 24 Sep, 2019 40 commits
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Qian Cai authored
When compiling a kernel with W=1, there are several of those warnings due to arm64 overriding a field on purpose. Just disable those warnings for both GCC and Clang of this file, so it will help dig "gems" hidden in the W=1 warnings by reducing some noises. mm/init-mm.c:39:2: warning: initializer overrides prior initialization of this subobject [-Winitializer-overrides] INIT_MM_CONTEXT(init_mm) ^~~~~~~~~~~~~~~~~~~~~~~~ ./arch/arm64/include/asm/mmu.h:133:9: note: expanded from macro 'INIT_MM_CONTEXT' .pgd = init_pg_dir, ^~~~~~~~~~~ mm/init-mm.c:30:10: note: previous initialization is here .pgd = swapper_pg_dir, ^~~~~~~~~~~~~~ Note: there is a side project trying to support explicitly allowing specific initializer overrides in Clang, but there is no guarantee it will happen or not. https://github.com/ClangBuiltLinux/linux/issues/639 Link: http://lkml.kernel.org/r/1566920867-27453-1-git-send-email-cai@lca.pwSigned-off-by:Qian Cai <cai@lca.pw> Cc: Nick Desaulniers <ndesaulniers@google.com> Cc: Masahiro Yamada <yamada.masahiro@socionext.com> Cc: Mark Rutland <mark.rutland@arm.com> Cc: Arnd Bergmann <arnd@arndb.de> Signed-off-by:
Andrew Morton <akpm@linux-foundation.org> Signed-off-by:
Linus Torvalds <torvalds@linux-foundation.org>
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Mike Rapoport authored
Replace open-coded bitmap array initialization of init_mm.cpu_bitmask with neat CPU_BITS_NONE macro. And, since init_mm.cpu_bitmask is statically set to zero, there is no way to clear it again in start_kernel(). Link: http://lkml.kernel.org/r/1565703815-8584-1-git-send-email-rppt@linux.ibm.comSigned-off-by:
Mike Rapoport <rppt@linux.ibm.com> Reviewed-by:
David Hildenbrand <david@redhat.com> Signed-off-by:
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Austin Kim authored
If !area->pages statement is true where memory allocation fails, area is freed. In this case 'area->pages = pages' should not executed. So move 'area->pages = pages' after if statement. [akpm@linux-foundation.org: give area->pages the same treatment] Link: http://lkml.kernel.org/r/20190830035716.GA190684@LGEARND20B15Signed-off-by:
Austin Kim <austindh.kim@gmail.com> Acked-by:
Michal Hocko <mhocko@suse.com> Reviewed-by:
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Pengfei Li authored
Objective --------- The current implementation of struct vmap_area wasted space. After applying this commit, sizeof(struct vmap_area) has been reduced from 11 words to 8 words. Description ----------- 1) Pack "subtree_max_size", "vm" and "purge_list". This is no problem because A) "subtree_max_size" is only used when vmap_area is in "free" tree B) "vm" is only used when vmap_area is in "busy" tree C) "purge_list" is only used when vmap_area is in vmap_purge_list 2) Eliminate "flags". ;Since only one flag VM_VM_AREA is being used, and the same thing can be done by judging whether "vm" is NULL, then the "flags" can be eliminated. Link: http://lkml.kernel.org/r/20190716152656.12255-3-lpf.vector@gmail.comSigned-off-by:
Pengfei Li <lpf.vector@gmail.com> Suggested-by:
Uladzislau Rezki (Sony) <urezki@gmail.com> Reviewed-by:
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Uladzislau Rezki (Sony) authored
The busy tree can be quite big, even though the area is freed or unmapped it still stays there until "purge" logic removes it. 1) Optimize and reduce the size of "busy" tree by removing a node from it right away as soon as user triggers free paths. It is possible to do so, because the allocation is done using another augmented tree. The vmalloc test driver shows the difference, for example the "fix_size_alloc_test" is ~11% better comparing with default configuration: sudo ./test_vmalloc.sh performance <default> Summary: fix_size_alloc_test loops: 1000000 avg: 993985 usec Summary: full_fit_alloc_test loops: 1000000 avg: 973554 usec Summary: long_busy_list_alloc_test loops: 1000000 avg: 12617652 usec <default> <this patch> Summary: fix_size_alloc_test loops: 1000000 avg: 882263 usec Summary: full_fit_alloc_test loops: 1000000 avg: 973407 usec Summary: long_busy_list_alloc_test loops: 1000000 avg: 12593929 usec <this patch> 2) Since the busy tree now contains allocated areas only and does not interfere with lazily free nodes, introduce the new function show_purge_info() that dumps "unpurged" areas that is propagated through "/proc/vmallocinfo". 3) Eliminate VM_LAZY_FREE flag. Link: http://lkml.kernel.org/r/20190716152656.12255-2-lpf.vector@gmail.comSigned-off-by:
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Alastair D'Silva authored
There is no possibility for memmap to be NULL in the current codebase. This check was added in commit 95a4774d ("memory-hotplug: update mce_bad_pages when removing the memory") where memmap was originally inited to NULL, and only conditionally given a value. The code that could have passed a NULL has been removed by commit ba72b4c8 ("mm/sparsemem: support sub-section hotplug"), so there is no longer a possibility that memmap can be NULL. Link: http://lkml.kernel.org/r/20190829035151.20975-1-alastair@d-silva.orgSigned-off-by:
Alastair D'Silva <alastair@d-silva.org> Acked-by:
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Alastair D'Silva authored
Use the function written to do it instead. Link: http://lkml.kernel.org/r/20190827053656.32191-2-alastair@au1.ibm.comSigned-off-by:
Wei Yang <richardw.yang@linux.intel.com> Reviewed-by:
Oscar Salvador <osalvador@suse.de> Signed-off-by:
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Wei Yang authored
__pfn_to_section is defined as __nr_to_section(pfn_to_section_nr(pfn)). Since we already get section_nr, it is not necessary to get mem_section from start_pfn. By doing so, we reduce one redundant operation. Link: http://lkml.kernel.org/r/20190809010242.29797-1-richardw.yang@linux.intel.comSigned-off-by:
Anshuman Khandual <anshuman.khandual@arm.com> Tested-by:
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Lecopzer Chen authored
The size argument passed into sparse_buffer_alloc() has already been aligned with PAGE_SIZE or PMD_SIZE. If the size after aligned is not power of 2 (e.g. 0x480000), the PTR_ALIGN() will return wrong value. Use roundup to round sparsemap_buf up to next multiple of size. Link: http://lkml.kernel.org/r/20190705114826.28586-1-lecopzer.chen@mediatek.comSigned-off-by:
Lecopzer Chen <lecopzer.chen@mediatek.com> Signed-off-by:
Mark-PK Tsai <Mark-PK.Tsai@mediatek.com> Cc: YJ Chiang <yj.chiang@mediatek.com> Cc: Lecopzer Chen <lecopzer.chen@mediatek.com> Cc: Pavel Tatashin <pasha.tatashin@oracle.com> Cc: Oscar Salvador <osalvador@suse.de> Cc: Michal Hocko <mhocko@suse.com> Cc: Mike Rapoport <rppt@linux.ibm.com> Signed-off-by:
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Lecopzer Chen authored
sparse_buffer_alloc(xsize) gets the size of memory from sparsemap_buf after being aligned with the size. However, the size is at least PAGE_ALIGN(sizeof(struct page) * PAGES_PER_SECTION) and usually larger than PAGE_SIZE. Also, sparse_buffer_fini() only frees memory between sparsemap_buf and sparsemap_buf_end, since sparsemap_buf may be changed by PTR_ALIGN() first, the aligned space before sparsemap_buf is wasted and no one will touch it. In our ARM32 platform (without SPARSEMEM_VMEMMAP) Sparse_buffer_init Reserve d359c000 - d3e9c000 (9M) Sparse_buffer_alloc Alloc d3a00000 - d3E80000 (4.5M) Sparse_buffer_fini Free d3e80000 - d3e9c000 (~=100k) The reserved memory between d359c000 - d3a00000 (~=4.4M) is unfreed. In ARM64 platform (with SPARSEMEM_VMEMMAP) sparse_buffer_init Reserve ffffffc07d623000 - ffffffc07f623000 (32M) Sparse_buffer_alloc Alloc ffffffc07d800000 - ffffffc07f600000 (30M) Sparse_buffer_fini Free ffffffc07f600000 - ffffffc07f623000 (140K) The reserved memory between ffffffc07d623000 - ffffffc07d800000 (~=1.9M) is unfreed. Let's explicit free redundant aligned memory. [arnd@arndb.de: mark sparse_buffer_free as __meminit] Link: http://lkml.kernel.org/r/20190709185528.3251709-1-arnd@arndb.de Link: http://lkml.kernel.org/r/20190705114730.28534-1-lecopzer.chen@mediatek.comSigned-off-by:Arnd Bergmann <arnd@arndb.de> Cc: YJ Chiang <yj.chiang@mediatek.com> Cc: Lecopzer Chen <lecopzer.chen@mediatek.com> Cc: Pavel Tatashin <pasha.tatashin@oracle.com> Cc: Oscar Salvador <osalvador@suse.de> Cc: Michal Hocko <mhocko@suse.com> Cc: Mike Rapoport <rppt@linux.ibm.com> Signed-off-by:
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Souptick Joarder authored
Correct typo in comment. Link: http://lkml.kernel.org/r/1568233954-3913-1-git-send-email-jrdr.linux@gmail.comSigned-off-by:
Souptick Joarder <jrdr.linux@gmail.com> Reviewed-by:
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David Hildenbrand authored
walk_system_ram_range() will fail with -EINVAL in case online_pages_range() was never called (== no resource applicable in the range). Otherwise, we will always call online_pages_range() with nr_pages > 0 and, therefore, have online_pages > 0. Remove that special handling. Link: http://lkml.kernel.org/r/20190814154109.3448-6-david@redhat.comSigned-off-by:
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David Hildenbrand authored
Commit a9cd410a ("mm/page_alloc.c: memory hotplug: free pages as higher order") assumed that any PFN we get via memory resources is aligned to to MAX_ORDER - 1, I am not convinced that is always true. Let's play safe, check the alignment and fallback to single pages. akpm: warn in this situation so we get to find out if and why this ever occurs. [akpm@linux-foundation.org: add WARN_ON_ONCE()] Link: http://lkml.kernel.org/r/20190814154109.3448-5-david@redhat.comSigned-off-by:
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David Hildenbrand authored
online_pages always corresponds to nr_pages. Simplify the code, getting rid of online_pages_blocks(). Add some comments. Link: http://lkml.kernel.org/r/20190814154109.3448-4-david@redhat.comSigned-off-by:
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David Hildenbrand authored
move_pfn_range_to_zone() will set all pages to PG_reserved via memmap_init_zone(). The only way a page could no longer be reserved would be if a MEM_GOING_ONLINE notifier would clear PG_reserved - which is not done (the online_page callback is used for that purpose by e.g., Hyper-V instead). walk_system_ram_range() will never call online_pages_range() with duplicate PFNs, so drop the PageReserved() check. This seems to be a leftover from ancient times where the memmap was initialized when adding memory and we wanted to check for already onlined memory. Link: http://lkml.kernel.org/r/20190814154109.3448-3-david@redhat.comSigned-off-by:
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David Hildenbrand authored
Patch series "mm/memory_hotplug: online_pages() cleanups", v2. Some cleanups (+ one fix for a special case) in the context of online_pages(). This patch (of 5): This makes it clearer that we will never call func() with duplicate PFNs in case we have multiple sub-page memory resources. All unaligned parts of PFNs are completely discarded. Link: http://lkml.kernel.org/r/20190814154109.3448-2-david@redhat.comSigned-off-by:
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Wei Yang authored
When offlining a node in try_offline_node(), pgdat is not released. So that pgdat could be reused in hotadd_new_pgdat(). While we reallocate pgdat->per_cpu_nodestats if this pgdat is reused. This patch prevents the memory leak by just allocating per_cpu_nodestats when it is a new pgdat. Link: http://lkml.kernel.org/r/20190813020608.10194-1-richardw.yang@linux.intel.comSigned-off-by:
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David Hildenbrand authored
Each memory block spans the same amount of sections/pages/bytes. The size is determined before the first memory block is created. No need to store what we can easily calculate - and the calculations even look simpler now. Michal brought up the idea of variable-sized memory blocks. However, if we ever implement something like this, we will need an API compatibility switch and reworks at various places (most code assumes a fixed memory block size). So let's cleanup what we have right now. While at it, fix the variable naming in register_mem_sect_under_node() - we no longer talk about a single section. Link: http://lkml.kernel.org/r/20190809110200.2746-1-david@redhat.comSigned-off-by:
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David Hildenbrand authored
Let's validate the memory block size early, when initializing the memory device infrastructure. Fail hard in case the value is not suitable. As nobody checks the return value of memory_dev_init(), turn it into a void function and fail with a panic in all scenarios instead. Otherwise, we'll crash later during boot when core/drivers expect that the memory device infrastructure (including memory_block_size_bytes()) works as expected. I think long term, we should move the whole memory block size configuration (set_memory_block_size_order() and memory_block_size_bytes()) into drivers/base/memory.c. Link: http://lkml.kernel.org/r/20190806090142.22709-1-david@redhat.comSigned-off-by:
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David Hildenbrand authored
Let's rephrase to memory block terminology and add some further clarifications. Link: http://lkml.kernel.org/r/20190806080826.5963-1-david@redhat.comSigned-off-by:
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David Hildenbrand authored
We don't allow to offline memory block devices that belong to multiple numa nodes. Therefore, such devices can never get removed. It is sufficient to process a single node when removing the memory block. No need to iterate over each and every PFN. We already have the nid stored for each memory block. Make sure that the nid always has a sane value. Please note that checking for node_online(nid) is not required. If we would have a memory block belonging to a node that is no longer offline, then we would have a BUG in the node offlining code. Link: http://lkml.kernel.org/r/20190719135244.15242-1-david@redhat.comSigned-off-by:
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David Hildenbrand authored
Let's remove this indirection. We need the zone in the caller either way, so let's just detect it there. Add some documentation for move_pfn_range_to_zone() instead. [akpm@linux-foundation.org: restore newline, per David] Link: http://lkml.kernel.org/r/20190724142324.3686-1-david@redhat.comSigned-off-by:
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Kefeng Wang authored
Using %px to show the actual address in print_bad_pte() to help us to debug issue. Link: http://lkml.kernel.org/r/20190831011816.141002-1-wangkefeng.wang@huawei.comSigned-off-by:
Kefeng Wang <wangkefeng.wang@huawei.com> Acked-by:
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Mike Rapoport authored
Both pgtable_cache_init() and pgd_cache_init() are used to initialize kmem cache for page table allocations on several architectures that do not use PAGE_SIZE tables for one or more levels of the page table hierarchy. Most architectures do not implement these functions and use __weak default NOP implementation of pgd_cache_init(). Since there is no such default for pgtable_cache_init(), its empty stub is duplicated among most architectures. Rename the definitions of pgd_cache_init() to pgtable_cache_init() and drop empty stubs of pgtable_cache_init(). Link: http://lkml.kernel.org/r/1566457046-22637-1-git-send-email-rppt@linux.ibm.comSigned-off-by:
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Mike Rapoport authored
The microblaze implementation of pte_alloc_one() has a provision to allocated PTEs from high memory, but neither CONFIG_HIGHPTE nor pte_map*() versions for suitable for HIGHPTE are defined. Except that, microblaze version of pte_alloc_one() is identical to the generic one as well as the implementations of pte_free() and pte_free_kernel(). Switch microblaze to use the generic versions of these functions. Also remove pte_free_slow() that is not referenced anywhere in the code. Link: http://lkml.kernel.org/r/1565690952-32158-1-git-send-email-rppt@linux.ibm.comSigned-off-by:
Mark Rutland <mark.rutland@arm.com> Cc: Michal Simek <monstr@monstr.eu> Signed-off-by:
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Mike Rapoport authored
The sh implementation pte_alloc_one(), pte_alloc_one_kernel(), pte_free_kernel() and pte_free() is identical to the generic except of lack of __GFP_ACCOUNT for the user PTEs allocation. Switch sh to use generic version of these functions. Link: http://lkml.kernel.org/r/1565250728-21721-4-git-send-email-rppt@linux.ibm.comSigned-off-by:
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Mike Rapoport authored
The ia64 implementation pte_alloc_one(), pte_alloc_one_kernel(), pte_free_kernel() and pte_free() is identical to the generic except of lack of __GFP_ACCOUNT for the user PTEs allocation. Switch ia64 to use generic version of these functions. Link: http://lkml.kernel.org/r/1565250728-21721-3-git-send-email-rppt@linux.ibm.comSigned-off-by:
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Nicholas Piggin authored
Patch series "mm: remove quicklist page table caches". A while ago Nicholas proposed to remove quicklist page table caches [1]. I've rebased his patch on the curren upstream and switched ia64 and sh to use generic versions of PTE allocation. [1] https://lore.kernel.org/linux-mm/20190711030339.20892-1-npiggin@gmail.com This patch (of 3): Remove page table allocator "quicklists". These have been around for a long time, but have not got much traction in the last decade and are only used on ia64 and sh architectures. The numbers in the initial commit look interesting but probably don't apply anymore. If anybody wants to resurrect this it's in the git history, but it's unhelpful to have this code and divergent allocator behaviour for minor archs. Also it might be better to instead make more general improvements to page allocator if this is still so slow. Link: http://lkml.kernel.org/r/1565250728-21721-2-git-send-email-rppt@linux.ibm.comSigned-off-by:
Nicholas Piggin <npiggin@gmail.com> Signed-off-by:
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Minchan Kim authored
In our testing (camera recording), Miguel and Wei found unmap_page_range() takes above 6ms with preemption disabled easily. When I see that, the reason is it holds page table spinlock during entire 512 page operation in a PMD. 6.2ms is never trivial for user experince if RT task couldn't run in the time because it could make frame drop or glitch audio problem. I had a time to benchmark it via adding some trace_printk hooks between pte_offset_map_lock and pte_unmap_unlock in zap_pte_range. The testing device is 2018 premium mobile device. I can get 2ms delay rather easily to release 2M(ie, 512 pages) when the task runs on little core even though it doesn't have any IPI and LRU lock contention. It's already too heavy. If I remove activate_page, 35-40% overhead of zap_pte_range is gone so most of overhead(about 0.7ms) comes from activate_page via mark_page_accessed. Thus, if there are LRU contention, that 0.7ms could accumulate up to several ms. So this patch adds a check for need_resched() in the loop, and a preemption point if necessary. Link: http://lkml.kernel.org/r/20190731061440.GC155569@google.comSigned-off-by:
Minchan Kim <minchan@kernel.org> Reported-by:
Miguel de Dios <migueldedios@google.com> Reported-by:
Wei Wang <wvw@google.com> Reviewed-by:
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Wei Yang authored
Since ptent will not be changed after previous assignment of entry, it is not necessary to do the assignment again. Link: http://lkml.kernel.org/r/20190708082740.21111-1-richardw.yang@linux.intel.comSigned-off-by:
Matthew Wilcox (Oracle) <willy@infradead.org> Cc: Will Deacon <will@kernel.org> Cc: Peter Zijlstra <peterz@infradead.org> Signed-off-by:
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John Hubbard authored
For pages that were retained via get_user_pages*(), release those pages via the new put_user_page*() routines, instead of via put_page() or release_pages(). This is part a tree-wide conversion, as described in fc1d8e7c ("mm: introduce put_user_page*(), placeholder versions"). Link: http://lkml.kernel.org/r/20190724044537.10458-4-jhubbard@nvidia.comSigned-off-by:
John Hubbard <jhubbard@nvidia.com> Acked-by:
Björn Töpel <bjorn.topel@intel.com> Cc: Björn Töpel <bjorn.topel@intel.com> Cc: Magnus Karlsson <magnus.karlsson@intel.com> Cc: David S. Miller <davem@davemloft.net> Signed-off-by:
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John Hubbard authored
For pages that were retained via get_user_pages*(), release those pages via the new put_user_page*() routines, instead of via put_page() or release_pages(). This is part a tree-wide conversion, as described in fc1d8e7c ("mm: introduce put_user_page*(), placeholder versions"). Also reverse the order of a comparison, in order to placate checkpatch.pl. Link: http://lkml.kernel.org/r/20190724044537.10458-3-jhubbard@nvidia.comSigned-off-by:
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akpm@linux-foundation.org authored
[11~From: John Hubbard <jhubbard@nvidia.com> Subject: mm/gup: add make_dirty arg to put_user_pages_dirty_lock() Patch series "mm/gup: add make_dirty arg to put_user_pages_dirty_lock()", v3. There are about 50+ patches in my tree [2], and I'll be sending out the remaining ones in a few more groups: * The block/bio related changes (Jerome mostly wrote those, but I've had to move stuff around extensively, and add a little code) * mm/ changes * other subsystem patches * an RFC that shows the current state of the tracking patch set. That can only be applied after all call sites are converted, but it's good to get an early look at it. This is part a tree-wide conversion, as described in fc1d8e7c ("mm: introduce put_user_page*(), placeholder versions"). This patch (of 3): Provide more capable variation of put_user_pages_dirty_lock(), and delete put_user_pages_dirty(). This is based on the following: 1. Lots of call sites become simpler if a bool is passed into put_user_page*(), instead of making the call site choose which put_user_page*() variant to call. 2. Christoph Hellwig's observation that set_page_dirty_lock() is usually correct, and set_page_dirty() is usually a bug, or at least questionable, within a put_user_page*() calling chain. This leads to the following API choices: * put_user_pages_dirty_lock(page, npages, make_dirty) * There is no put_user_pages_dirty(). You have to hand code that, in the rare case that it's required. [jhubbard@nvidia.com: remove unused variable in siw_free_plist()] Link: http://lkml.kernel.org/r/20190729074306.10368-1-jhubbard@nvidia.com Link: http://lkml.kernel.org/r/20190724044537.10458-2-jhubbard@nvidia.comSigned-off-by:
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Johannes Weiner authored
One of our services observed a high rate of cgroup OOM kills in the presence of large amounts of clean cache. Debugging showed that the culprit is the shared cgroup iteration in page reclaim. Under high allocation concurrency, multiple threads enter reclaim at the same time. Fearing overreclaim when we first switched from the single global LRU to cgrouped LRU lists, we introduced a shared iteration state for reclaim invocations - whether 1 or 20 reclaimers are active concurrently, we only walk the cgroup tree once: the 1st reclaimer reclaims the first cgroup, the second the second one etc. With more reclaimers than cgroups, we start another walk from the top. This sounded reasonable at the time, but the problem is that reclaim concurrency doesn't scale with allocation concurrency. As reclaim concurrency increases, the amount of memory individual reclaimers get to scan gets smaller and smaller. Individual reclaimers may only see one cgroup per cycle, and that may not have much reclaimable memory. We see individual reclaimers declare OOM when there is plenty of reclaimable memory available in cgroups they didn't visit. This patch does away with the shared iterator, and every reclaimer is allowed to scan the full cgroup tree and see all of reclaimable memory, just like it would on a non-cgrouped system. This way, when OOM is declared, we know that the reclaimer actually had a chance. To still maintain fairness in reclaim pressure, disallow cgroup reclaim from bailing out of the tree walk early. Kswapd and regular direct reclaim already don't bail, so it's not clear why limit reclaim would have to, especially since it only walks subtrees to begin with. This change completely eliminates the OOM kills on our service, while showing no signs of overreclaim - no increased scan rates, %sys time, or abrupt free memory spikes. I tested across 100 machines that have 64G of RAM and host about 300 cgroups each. [ It's possible overreclaim never was a *practical* issue to begin with - it was simply a concern we had on the mailing lists at the time, with no real data to back it up. But we have also added more bail-out conditions deeper inside reclaim (e.g. the proportional exit in shrink_node_memcg) since. Regardless, now we have data that suggests full walks are more reliable and scale just fine. ] Link: http://lkml.kernel.org/r/20190812192316.13615-1-hannes@cmpxchg.orgSigned-off-by:
Johannes Weiner <hannes@cmpxchg.org> Reviewed-by:
Roman Gushchin <guro@fb.com> Acked-by:
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Roman Gushchin authored
Commit 72f0184c ("mm, memcg: remove hotplug locking from try_charge") introduced css_tryget()/css_put() calls in drain_all_stock(), which are supposed to protect the target memory cgroup from being released during the mem_cgroup_is_descendant() call. However, it's not completely safe. In theory, memcg can go away between reading stock->cached pointer and calling css_tryget(). This can happen if drain_all_stock() races with drain_local_stock() performed on the remote cpu as a result of a work, scheduled by the previous invocation of drain_all_stock(). The race is a bit theoretical and there are few chances to trigger it, but the current code looks a bit confusing, so it makes sense to fix it anyway. The code looks like as if css_tryget() and css_put() are used to protect stocks drainage. It's not necessary because stocked pages are holding references to the cached cgroup. And it obviously won't work for works, scheduled on other cpus. So, let's read the stock->cached pointer and evaluate the memory cgroup inside a rcu read section, and get rid of css_tryget()/css_put() calls. Link: http://lkml.kernel.org/r/20190802192241.3253165-1-guro@fb.comSigned-off-by:
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Chris Down authored
We're trying to use memory.high to limit workloads, but have found that containment can frequently fail completely and cause OOM situations outside of the cgroup. This happens especially with swap space -- either when none is configured, or swap is full. These failures often also don't have enough warning to allow one to react, whether for a human or for a daemon monitoring PSI. Here is output from a simple program showing how long it takes in usec (column 2) to allocate a megabyte of anonymous memory (column 1) when a cgroup is already beyond its memory high setting, and no swap is available: [root@ktst ~]# systemd-run -p MemoryHigh=100M -p MemorySwapMax=1 \ > --wait -t timeout 300 /root/mdf [...] 95 1035 96 1038 97 1000 98 1036 99 1048 100 1590 101 1968 102 1776 103 1863 104 1757 105 1921 106 1893 107 1760 108 1748 109 1843 110 1716 111 1924 112 1776 113 1831 114 1766 115 1836 116 1588 117 1912 118 1802 119 1857 120 1731 [...] [System OOM in 2-3 seconds] The delay does go up extremely marginally past the 100MB memory.high threshold, as now we spend time scanning before returning to usermode, but it's nowhere near enough to contain growth. It also doesn't get worse the more pages you have, since it only considers nr_pages. The current situation goes against both the expectations of users of memory.high, and our intentions as cgroup v2 developers. In cgroup-v2.txt, we claim that we will throttle and only under "extreme conditions" will memory.high protection be breached. Likewise, cgroup v2 users generally also expect that memory.high should throttle workloads as they exceed their high threshold. However, as seen above, this isn't always how it works in practice -- even on banal setups like those with no swap, or where swap has become exhausted, we can end up with memory.high being breached and us having no weapons left in our arsenal to combat runaway growth with, since reclaim is futile. It's also hard for system monitoring software or users to tell how bad the situation is, as "high" events for the memcg may in some cases be benign, and in others be catastrophic. The current status quo is that we fail containment in a way that doesn't provide any advance warning that things are about to go horribly wrong (for example, we are about to invoke the kernel OOM killer). This patch introduces explicit throttling when reclaim is failing to keep memcg size contained at the memory.high setting. It does so by applying an exponential delay curve derived from the memcg's overage compared to memory.high. In the normal case where the memcg is either below or only marginally over its memory.high setting, no throttling will be performed. This composes well with system health monitoring and remediation, as these allocator delays are factored into PSI's memory pressure calculations. This both creates a mechanism system administrators or applications consuming the PSI interface to trivially see that the memcg in question is struggling and use that to make more reasonable decisions, and permits them enough time to act. Either of these can act with significantly more nuance than that we can provide using the system OOM killer. This is a similar idea to memory.oom_control in cgroup v1 which would put the cgroup to sleep if the threshold was violated, but it's also significantly improved as it results in visible memory pressure, and also doesn't schedule indefinitely, which previously made tracing and other introspection difficult (ie. it's clamped at 2*HZ per allocation through MEMCG_MAX_HIGH_DELAY_JIFFIES). Contrast the previous results with a kernel with this patch: [root@ktst ~]# systemd-run -p MemoryHigh=100M -p MemorySwapMax=1 \ > --wait -t timeout 300 /root/mdf [...] 95 1002 96 1000 97 1002 98 1003 99 1000 100 1043 101 84724 102 330628 103 610511 104 1016265 105 1503969 106 2391692 107 2872061 108 3248003 109 4791904 110 5759832 111 6912509 112 8127818 113 9472203 114 12287622 115 12480079 116 14144008 117 15808029 118 16384500 119 16383242 120 16384979 [...] As you can see, in the normal case, memory allocation takes around 1000 usec. However, as we exceed our memory.high, things start to increase exponentially, but fairly leniently at first. Our first megabyte over memory.high takes us 0.16 seconds, then the next is 0.46 seconds, then the next is almost an entire second. This gets worse until we reach our eventual 2*HZ clamp per batch, resulting in 16 seconds per megabyte. However, this is still making forward progress, so permits tracing or further analysis with programs like GDB. We use an exponential curve for our delay penalty for a few reasons: 1. We run mem_cgroup_handle_over_high to potentially do reclaim after we've already performed allocations, which means that temporarily going over memory.high by a small amount may be perfectly legitimate, even for compliant workloads. We don't want to unduly penalise such cases. 2. An exponential curve (as opposed to a static or linear delay) allows ramping up memory pressure stats more gradually, which can be useful to work out that you have set memory.high too low, without destroying application performance entirely. This patch expands on earlier work by Johannes Weiner. Thanks! [akpm@linux-foundation.org: fix max() warning] [akpm@linux-foundation.org: fix __udivdi3 ref on 32-bit] [akpm@linux-foundation.org: fix it even more] [chris@chrisdown.name: fix 64-bit divide even more] Link: http://lkml.kernel.org/r/20190723180700.GA29459@chrisdown.nameSigned-off-by:Chris Down <chris@chrisdown.name> Acked-by:
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Matthew Wilcox (Oracle) authored
Transparent Huge Pages are currently stored in i_pages as pointers to consecutive subpages. This patch changes that to storing consecutive pointers to the head page in preparation for storing huge pages more efficiently in i_pages. Large parts of this are "inspired" by Kirill's patch https://lore.kernel.org/lkml/20170126115819.58875-2-kirill.shutemov@linux.intel.com/ Kirill and Huang Ying contributed several fixes. [willy@infradead.org: use compound_nr, squish uninit-var warning] Link: http://lkml.kernel.org/r/20190731210400.7419-1-willy@infradead.orgSigned-off-by:
Jan Kara <jack@suse.cz> Reviewed-by:
Kirill Shutemov <kirill@shutemov.name> Reviewed-by:
Song Liu <songliubraving@fb.com> Tested-by:
William Kucharski <william.kucharski@oracle.com> Reviewed-by:
Mikhail Gavrilov <mikhail.v.gavrilov@gmail.com> Cc: Hugh Dickins <hughd@google.com> Cc: Chris Wilson <chris@chris-wilson.co.uk> Cc: Song Liu <songliubraving@fb.com> Signed-off-by:
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Konstantin Khlebnikov authored
This actually checks that writeback is needed or in progress. Link: http://lkml.kernel.org/r/156378817069.1087.1302816672037672488.stgit@buzzSigned-off-by:
Konstantin Khlebnikov <khlebnikov@yandex-team.ru> Reviewed-by:
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Konstantin Khlebnikov authored
Functions like filemap_write_and_wait_range() should do nothing if inode has no dirty pages or pages currently under writeback. But they anyway construct struct writeback_control and this does some atomic operations if CONFIG_CGROUP_WRITEBACK=y - on fast path it locks inode->i_lock and updates state of writeback ownership, on slow path might be more work. Current this path is safely avoided only when inode mapping has no pages. For example generic_file_read_iter() calls filemap_write_and_wait_range() at each O_DIRECT read - pretty hot path. This patch skips starting new writeback if mapping has no dirty tags set. If writeback is already in progress filemap_write_and_wait_range() will wait for it. Link: http://lkml.kernel.org/r/156378816804.1087.8607636317907921438.stgit@buzzSigned-off-by:
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Vlastimil Babka authored
The debug_pagealloc functionality is useful to catch buggy page allocator users that cause e.g. use after free or double free. When page inconsistency is detected, debugging is often simpler by knowing the call stack of process that last allocated and freed the page. When page_owner is also enabled, we record the allocation stack trace, but not freeing. This patch therefore adds recording of freeing process stack trace to page owner info, if both page_owner and debug_pagealloc are configured and enabled. With only page_owner enabled, this info is not useful for the memory leak debugging use case. dump_page() is adjusted to print the info. An example result of calling __free_pages() twice may look like this (note the page last free stack trace): BUG: Bad page state in process bash pfn:13d8f8 page:ffffc31984f63e00 refcount:-1 mapcount:0 mapping:0000000000000000 index:0x0 flags: 0x1affff800000000() raw: 01affff800000000 dead000000000100 dead000000000122 0000000000000000 raw: 0000000000000000 0000000000000000 ffffffffffffffff 0000000000000000 page dumped because: nonzero _refcount page_owner tracks the page as freed page last allocated via order 0, migratetype Unmovable, gfp_mask 0xcc0(GFP_KERNEL) prep_new_page+0x143/0x150 get_page_from_freelist+0x289/0x380 __alloc_pages_nodemask+0x13c/0x2d0 khugepaged+0x6e/0xc10 kthread+0xf9/0x130 ret_from_fork+0x3a/0x50 page last free stack trace: free_pcp_prepare+0x134/0x1e0 free_unref_page+0x18/0x90 khugepaged+0x7b/0xc10 kthread+0xf9/0x130 ret_from_fork+0x3a/0x50 Modules linked in: CPU: 3 PID: 271 Comm: bash Not tainted 5.3.0-rc4-2.g07a1a73-default+ #57 Hardware name: QEMU Standard PC (i440FX + PIIX, 1996), BIOS rel-1.12.1-0-ga5cab58-prebuilt.qemu.org 04/01/2014 Call Trace: dump_stack+0x85/0xc0 bad_page.cold+0xba/0xbf rmqueue_pcplist.isra.0+0x6c5/0x6d0 rmqueue+0x2d/0x810 get_page_from_freelist+0x191/0x380 __alloc_pages_nodemask+0x13c/0x2d0 __get_free_pages+0xd/0x30 __pud_alloc+0x2c/0x110 copy_page_range+0x4f9/0x630 dup_mmap+0x362/0x480 dup_mm+0x68/0x110 copy_process+0x19e1/0x1b40 _do_fork+0x73/0x310 __x64_sys_clone+0x75/0x80 do_syscall_64+0x6e/0x1e0 entry_SYSCALL_64_after_hwframe+0x49/0xbe RIP: 0033:0x7f10af854a10 ... Link: http://lkml.kernel.org/r/20190820131828.22684-5-vbabka@suse.czSigned-off-by:
Vlastimil Babka <vbabka@suse.cz> Cc: Kirill A. Shutemov <kirill@shutemov.name> Cc: Matthew Wilcox <willy@infradead.org> Cc: Mel Gorman <mgorman@techsingularity.net> Cc: Michal Hocko <mhocko@kernel.org> Signed-off-by:
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