- 29 Apr, 2013 40 commits
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Cody P Schafer authored
[sfr@canb.auug.org.au: add missing semicolon] Signed-off-by:
Cody P Schafer <cody@linux.vnet.ibm.com> Cc: "H. Peter Anvin" <hpa@zytor.com> Cc: Ingo Molnar <mingo@redhat.com> Cc: Benjamin Herrenschmidt <benh@kernel.crashing.org> Cc: Yinghai Lu <yinghai@kernel.org> Signed-off-by:
Stephen Rothwell <sfr@canb.auug.org.au> Signed-off-by:
Andrew Morton <akpm@linux-foundation.org> Signed-off-by:
Linus Torvalds <torvalds@linux-foundation.org>
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Cody P Schafer authored
Signed-off-by:
Yinghai Lu <yinghai@kernel.org> Signed-off-by:
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Cody P Schafer authored
powerpc and x86 were opencoding copies of setup_nr_node_ids(), which page_alloc provides but makes static. Make it avaliable to the archs in linux/mm.h. Signed-off-by:
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Russ Anderson authored
When booting on a large memory system, the kernel spends considerable time in memmap_init_zone() setting up memory zones. Analysis shows significant time spent in __early_pfn_to_nid(). The routine memmap_init_zone() checks each PFN to verify the nid is valid. __early_pfn_to_nid() sequentially scans the list of pfn ranges to find the right range and returns the nid. This does not scale well. On a 4 TB (single rack) system there are 308 memory ranges to scan. The higher the PFN the more time spent sequentially spinning through memory ranges. Since memmap_init_zone() increments pfn, it will almost always be looking for the same range as the previous pfn, so check that range first. If it is in the same range, return that nid. If not, scan the list as before. A 4 TB (single rack) UV1 system takes 512 seconds to get through the zone code. This performance optimization reduces the time by 189 seconds, a 36% improvement. A 2 TB (single rack) UV2 system goes from 212.7 seconds to 99.8 seconds, a 112.9 second (53%) reduction. [akpm@linux-foundation.org: make the statics __meminitdata] [akpm@linux-foundation.org: fix comment formatting] [akpm@linux-foundation.org: fix ia64, per yinghai] [akpm@linux-foundation.org: add missing semicolon, per Tony] Signed-off-by:
Russ Anderson <rja@sgi.com> Cc: David Rientjes <rientjes@google.com> Cc: Ingo Molnar <mingo@elte.hu> Cc: Thomas Gleixner <tglx@linutronix.de> Cc: "H. Peter Anvin" <hpa@zytor.com> Tested-by:
"Luck, Tony" <tony.luck@intel.com> Cc: Yinghai Lu <yinghai@kernel.org> Cc: Lin Feng <linfeng@cn.fujitsu.com> Cc: KOSAKI Motohiro <kosaki.motohiro@gmail.com> Signed-off-by:
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Jianguo Wu authored
Signed-off-by:
Jianguo Wu <wujianguo@huawei.com> Signed-off-by:
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Mel Gorman authored
The following problem was reported against a distribution kernel when zone_reclaim was enabled but the same problem applies to the mainline kernel. The reproduction case was as follows 1. Run numactl -m +0 dd if=largefile of=/dev/null This allocates a large number of clean pages in node 0 2. numactl -N +0 memhog 0.5*Mg This start a memory-using application in node 0. The expected behaviour is that the clean pages get reclaimed and the application uses node 0 for its memory. The observed behaviour was that the memory for the memhog application was allocated off-node since commits cd38b115 ("mm: page allocator: initialise ZLC for first zone eligible for zone_reclaim") and commit 76d3fbf8 ("mm: page allocator: reconsider zones for allocation after direct reclaim"). The assumption of those patches was that it was always preferable to allocate quickly than stall for long periods of time and they were meant to take care that the zone was only marked full when necessary but an important case was missed. In the allocator fast path, only the low watermarks are checked. If the zones free pages are between the low and min watermark then allocations from the allocators slow path will succeed. However, zone_reclaim will only reclaim SWAP_CLUSTER_MAX or 1<<order pages. There is no guarantee that this will meet the low watermark causing the zone to be marked full prematurely. This patch will only mark the zone full after zone_reclaim if it the min watermarks are checked or if page reclaim failed to make sufficient progress. [mhocko@suse.cz: fix alloc_flags test] Signed-off-by:
Mel Gorman <mgorman@suse.de> Reported-by:
Hedi Berriche <hedi@sgi.com> Tested-by:
Michal Hocko <mhocko@suse.cz> Reviewed-by:
Wanpeng Li <liwanp@linux.vnet.ibm.com> Signed-off-by:
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Johannes Weiner authored
Memory hotplug can happen on a machine under load, memory shortness and fragmentation, so huge page allocations for the vmemmap are not guaranteed to succeed. Try to fall back to regular pages before failing the hotplug event completely. Signed-off-by:
Johannes Weiner <hannes@cmpxchg.org> Cc: Ben Hutchings <ben@decadent.org.uk> Cc: Bernhard Schmidt <Bernhard.Schmidt@lrz.de> Cc: Johannes Weiner <hannes@cmpxchg.org> Cc: Russell King <rmk@arm.linux.org.uk> Cc: Ingo Molnar <mingo@elte.hu> Cc: Thomas Gleixner <tglx@linutronix.de> Cc: "H. Peter Anvin" <hpa@zytor.com> Cc: Benjamin Herrenschmidt <benh@kernel.crashing.org> Cc: "Luck, Tony" <tony.luck@intel.com> Cc: Heiko Carstens <heiko.carstens@de.ibm.com> Cc: David Miller <davem@davemloft.net> Signed-off-by:
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Johannes Weiner authored
We already have generic code to allocate vmemmap with regular pages, use it. Signed-off-by:
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Johannes Weiner authored
No need to maintain addr_end and p_end when they are never actually read anywhere on !pse setups. Remove the dead code. Signed-off-by:
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Johannes Weiner authored
The sparse code, when asking the architecture to populate the vmemmap, specifies the section range as a starting page and a number of pages. This is an awkward interface, because none of the arch-specific code actually thinks of the range in terms of 'struct page' units and always translates it to bytes first. In addition, later patches mix huge page and regular page backing for the vmemmap. For this, they need to call vmemmap_populate_basepages() on sub-section ranges with PAGE_SIZE and PMD_SIZE in mind. But these are not necessarily multiples of the 'struct page' size and so this unit is too coarse. Just translate the section range into bytes once in the generic sparse code, then pass byte ranges down the stack. Signed-off-by:
David S. Miller <davem@davemloft.net> Tested-by:
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Ben Hutchings authored
Hot-adding memory on x86_64 normally requires huge page allocation. When this is done to a VM guest, it's usually because the system is already tight on memory, so the request tends to fail. Try to avoid this by adding __GFP_REPEAT to the allocation flags. Addresses http://bugs.debian.org/699913Signed-off-by:
Ben Hutchings <ben@decadent.org.uk> Signed-off-by:
Bernhard Schmidt <Bernhard.Schmidt@lrz.de> Tested-by:
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David Rientjes authored
Particularly in oom conditions, it's troublesome that hugetlb memory is not displayed. All other meminfo that is emitted will not add up to what is expected, and there is no artifact left in the kernel log to show that a potentially significant amount of memory is actually allocated as hugepages which are not available to be reclaimed. Booting with hugepages=8192 on the command line, this memory is now shown in oom conditions. For example, with echo m > /proc/sysrq-trigger: Node 0 hugepages_total=2048 hugepages_free=2048 hugepages_surp=0 hugepages_size=2048kB Node 1 hugepages_total=2048 hugepages_free=2048 hugepages_surp=0 hugepages_size=2048kB Node 2 hugepages_total=2048 hugepages_free=2048 hugepages_surp=0 hugepages_size=2048kB Node 3 hugepages_total=2048 hugepages_free=2048 hugepages_surp=0 hugepages_size=2048kB [akpm@linux-foundation.org: coding-style fixes] Signed-off-by:
David Rientjes <rientjes@google.com> Acked-by:
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Hampson, Steven T authored
Using mbind to change the mempolicy to MPOL_BIND on several adjacent mmapped blocks may result in a reset of the mempolicy to MPOL_DEFAULT in vma_adjust. Test code. Correct result is three lines containing "OK". #include <stdio.h> #include <unistd.h> #include <sys/mman.h> #include <numaif.h> #include <errno.h> /* gcc mbind_test.c -lnuma -o mbind_test -Wall */ #define MAXNODE 4096 void allocate() { int ret; int len; int policy = -1; unsigned char *p; unsigned long mask[MAXNODE] = { 0 }; unsigned long retmask[MAXNODE] = { 0 }; len = getpagesize() * 0x2fc00; p = mmap(NULL, len, PROT_READ|PROT_WRITE, MAP_PRIVATE|MAP_ANONYMOUS, -1, 0); if (p == MAP_FAILED) printf("mbind err: %d\n", errno); mask[0] = 1; ret = mbind(p, len, MPOL_BIND, mask, MAXNODE, 0); if (ret < 0) printf("mbind err: %d %d\n", ret, errno); ret = get_mempolicy(&policy, retmask, MAXNODE, p, MPOL_F_ADDR); if (ret < 0) printf("get_mempolicy err: %d %d\n", ret, errno); if (policy == MPOL_BIND) printf("OK\n"); else printf("ERROR: policy is %d\n", policy); } int main() { allocate(); allocate(); allocate(); return 0; } Signed-off-by:Steven T Hampson <steven.t.hampson@intel.com> Cc: Mel Gorman <mgorman@suse.de> Cc: KOSAKI Motohiro <kosaki.motohiro@jp.fujitsu.com> Cc: Rik van Riel <riel@redhat.com> Cc: Andi Kleen <andi@firstfloor.org> Signed-off-by:
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Catalin Marinas authored
ARM processors with LPAE enabled use 3 levels of page tables, with an entry in the top level (pgd) covering 1GB of virtual space. Because of the branch relocation limitations on ARM, the loadable modules are mapped 16MB below PAGE_OFFSET, making the corresponding 1GB pgd shared between kernel modules and user space. If free_pgtables() is called with the default ceiling 0, free_pgd_range() (and subsequently called functions) also frees the page table shared between user space and kernel modules (which is normally handled by the ARM-specific pgd_free() function). This patch changes defines the ARM USER_PGTABLES_CEILING to TASK_SIZE when CONFIG_ARM_LPAE is enabled. Note that the pgd_free() function already checks the presence of the shared pmd page allocated by pgd_alloc() and frees it, though with ceiling 0 this wasn't necessary. Signed-off-by:
Catalin Marinas <catalin.marinas@arm.com> Cc: Russell King <linux@arm.linux.org.uk> Cc: Hugh Dickins <hughd@google.com> Cc: <stable@vger.kernel.org> [3.3+] Signed-off-by:
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Hugh Dickins authored
On architectures where a pgd entry may be shared between user and kernel (e.g. ARM+LPAE), freeing page tables needs a ceiling other than 0. This patch introduces a generic USER_PGTABLES_CEILING that arch code can override. It is the responsibility of the arch code setting the ceiling to ensure the complete freeing of the page tables (usually in pgd_free()). [catalin.marinas@arm.com: commit log; shift_arg_pages(), asm-generic/pgtables.h changes] Signed-off-by:
Hugh Dickins <hughd@google.com> Signed-off-by:
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Michal Hocko authored
Since commit 2d11085e ("memcg: do not create memsw files if swap accounting is disabled") memsw files are created only if memcg swap accounting is enabled so it doesn't make any sense to check for it explicitly in mem_cgroup_read(), mem_cgroup_write() and mem_cgroup_reset(). Signed-off-by:
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Zhang Yanfei authored
Remove the WARN_ON_ONCE(!mm) check as the comment suggested. Kernel code calls find_vma only when it is absolutely sure that the mm_struct arg to it is non-NULL. Signed-off-by:
Zhang Yanfei <zhangyanfei@cn.fujitsu.com> Cc: k80c <k80ck80c@gmail.com> Cc: Michel Lespinasse <walken@google.com> Signed-off-by:
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Atsushi Kumagai authored
Now, vmap_area_list is exported as VMCOREINFO for makedumpfile to get the start address of vmalloc region (vmalloc_start). The address which contains vmalloc_start value is represented as below: vmap_area_list.next - OFFSET(vmap_area.list) + OFFSET(vmap_area.va_start) However, both OFFSET(vmap_area.va_start) and OFFSET(vmap_area.list) aren't exported as VMCOREINFO. So this patch exports them externally with small cleanup. [akpm@linux-foundation.org: vmalloc.h should include list.h for list_head] Signed-off-by:
Atsushi Kumagai <kumagai-atsushi@mxc.nes.nec.co.jp> Cc: Joonsoo Kim <js1304@gmail.com> Cc: Joonsoo Kim <iamjoonsoo.kim@lge.com> Cc: Thomas Gleixner <tglx@linutronix.de> Cc: "H. Peter Anvin" <hpa@zytor.com> Cc: Atsushi Kumagai <kumagai-atsushi@mxc.nes.nec.co.jp> Cc: Chris Metcalf <cmetcalf@tilera.com> Cc: Dave Anderson <anderson@redhat.com> Cc: Eric Biederman <ebiederm@xmission.com> Cc: Guan Xuetao <gxt@mprc.pku.edu.cn> Cc: Ingo Molnar <mingo@kernel.org> Cc: Vivek Goyal <vgoyal@redhat.com> Signed-off-by:
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Joonsoo Kim authored
Now, there is no need to maintain vmlist after initializing vmalloc. So remove related code and data structure. Signed-off-by:
Joonsoo Kim <js1304@gmail.com> Signed-off-by:
Joonsoo Kim <iamjoonsoo.kim@lge.com> Cc: Thomas Gleixner <tglx@linutronix.de> Cc: "H. Peter Anvin" <hpa@zytor.com> Cc: Atsushi Kumagai <kumagai-atsushi@mxc.nes.nec.co.jp> Cc: Chris Metcalf <cmetcalf@tilera.com> Cc: Dave Anderson <anderson@redhat.com> Cc: Eric Biederman <ebiederm@xmission.com> Cc: Guan Xuetao <gxt@mprc.pku.edu.cn> Cc: Ingo Molnar <mingo@kernel.org> Cc: Vivek Goyal <vgoyal@redhat.com> Signed-off-by:
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Joonsoo Kim authored
Although our intention is to unexport internal structure entirely, but there is one exception for kexec. kexec dumps address of vmlist and makedumpfile uses this information. We are about to remove vmlist, then another way to retrieve information of vmalloc layer is needed for makedumpfile. For this purpose, we export vmap_area_list, instead of vmlist. Signed-off-by:
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Joonsoo Kim authored
This patch is a preparatory step for removing vmlist entirely. For above purpose, we change iterating a vmap_list codes to iterating a vmap_area_list. It is somewhat trivial change, but just one thing should be noticed. Using vmap_area_list in vmallocinfo() introduce ordering problem in SMP system. In s_show(), we retrieve some values from vm_struct. vm_struct's values is not fully setup when va->vm is assigned. Full setup is notified by removing VM_UNLIST flag without holding a lock. When we see that VM_UNLIST is removed, it is not ensured that vm_struct has proper values in view of other CPUs. So we need smp_[rw]mb for ensuring that proper values is assigned when we see that VM_UNLIST is removed. Therefore, this patch not only change a iteration list, but also add a appropriate smp_[rw]mb to right places. Signed-off-by:
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Joonsoo Kim authored
This patch is a preparatory step for removing vmlist entirely. For above purpose, we change iterating a vmap_list codes to iterating a vmap_area_list. It is somewhat trivial change, but just one thing should be noticed. vmlist is lack of information about some areas in vmalloc address space. For example, vm_map_ram() allocate area in vmalloc address space, but it doesn't make a link with vmlist. To provide full information about vmalloc address space is better idea, so we don't use va->vm and use vmap_area directly. This makes get_vmalloc_info() more precise. Signed-off-by:
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Joonsoo Kim authored
Now, when we hold a vmap_area_lock, va->vm can't be discarded. So we can safely access to va->vm when iterating a vmap_area_list with holding a vmap_area_lock. With this property, change iterating vmlist codes in vread/vwrite() to iterating vmap_area_list. There is a little difference relate to lock, because vmlist_lock is mutex, but, vmap_area_lock is spin_lock. It may introduce a spinning overhead during vread/vwrite() is executing. But, these are debug-oriented functions, so this overhead is not real problem for common case. Signed-off-by:
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Joonsoo Kim authored
Inserting and removing an entry to vmlist is linear time complexity, so it is inefficient. Following patches will try to remove vmlist entirely. This patch is preparing step for it. For removing vmlist, iterating vmlist codes should be changed to iterating a vmap_area_list. Before implementing that, we should make sure that when we iterate a vmap_area_list, accessing to va->vm doesn't cause a race condition. This patch ensure that when iterating a vmap_area_list, there is no race condition for accessing to vm_struct. Signed-off-by:
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Joonsoo Kim authored
Now get_vmalloc_info() is in fs/proc/mmu.c. There is no reason that this code must be here and it's implementation needs vmlist_lock and it iterate a vmlist which may be internal data structure for vmalloc. It is preferable that vmlist_lock and vmlist is only used in vmalloc.c for maintainability. So move the code to vmalloc.c Signed-off-by:
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Joonsoo Kim authored
This patchset removes vm_struct list management after initializing vmalloc. Adding and removing an entry to vmlist is linear time complexity, so it is inefficient. If we maintain this list, overall time complexity of adding and removing area to vmalloc space is O(N), although we use rbtree for finding vacant place and it's time complexity is just O(logN). And vmlist and vmlist_lock is used many places of outside of vmalloc.c. It is preferable that we hide this raw data structure and provide well-defined function for supporting them, because it makes that they cannot mistake when manipulating theses structure and it makes us easily maintain vmalloc layer. For kexec and makedumpfile, I export vmap_area_list, instead of vmlist. This comes from Atsushi's recommendation. For more information, please refer below link. https://lkml.org/lkml/2012/12/6/184 This patch: The purpose of iterating a vmlist is finding vm area with specific virtual address. find_vm_area() is provided for this purpose and more efficient, because it uses a rbtree. So change it. Signed-off-by:
Guan Xuetao <gxt@mprc.pku.edu.cn> Acked-by:
Ingo Molnar <mingo@kernel.org> Acked-by:
Chris Metcalf <cmetcalf@tilera.com> Cc: Thomas Gleixner <tglx@linutronix.de> Cc: "H. Peter Anvin" <hpa@zytor.com> Cc: Atsushi Kumagai <kumagai-atsushi@mxc.nes.nec.co.jp> Cc: Dave Anderson <anderson@redhat.com> Cc: Eric Biederman <ebiederm@xmission.com> Cc: Vivek Goyal <vgoyal@redhat.com> Signed-off-by:
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Darrick J. Wong authored
Walking a bio's page mappings has proved problematic, so create a new bio flag to indicate that a bio's data needs to be snapshotted in order to guarantee stable pages during writeback. Next, for the one user (ext3/jbd) of snapshotting, hook all the places where writes can be initiated without PG_writeback set, and set BIO_SNAP_STABLE there. We must also flag journal "metadata" bios for stable writeout, since file data can be written through the journal. Finally, the MS_SNAP_STABLE mount flag (only used by ext3) is now superfluous, so get rid of it. [akpm@linux-foundation.org: rename _submit_bh()'s `flags' to `bio_flags', delobotomize the _submit_bh declaration] [akpm@linux-foundation.org: teeny cleanup] Signed-off-by:
Darrick J. Wong <darrick.wong@oracle.com> Cc: Andy Lutomirski <luto@amacapital.net> Cc: Adrian Hunter <adrian.hunter@intel.com> Cc: Artem Bityutskiy <dedekind1@gmail.com> Reviewed-by:
Jan Kara <jack@suse.cz> Cc: Jens Axboe <axboe@kernel.dk> Signed-off-by:
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Gerald Schaefer authored
Commit abf09bed ("s390/mm: implement software dirty bits") introduced another difference in the pte layout vs. the pmd layout on s390, thoroughly breaking the s390 support for hugetlbfs. This requires replacing some more pte_xxx functions in mm/hugetlbfs.c with a huge_pte_xxx version. This patch introduces those huge_pte_xxx functions and their generic implementation in asm-generic/hugetlb.h, which will now be included on all architectures supporting hugetlbfs apart from s390. This change will be a no-op for those architectures. [akpm@linux-foundation.org: fix warning] Signed-off-by:
Gerald Schaefer <gerald.schaefer@de.ibm.com> Cc: Mel Gorman <mgorman@suse.de> Cc: Hugh Dickins <hughd@google.com> Cc: Hillf Danton <dhillf@gmail.com> Acked-by: Michal Hocko <mhocko@suse.cz> [for !s390 parts] Cc: Tony Luck <tony.luck@intel.com> Cc: Fenghua Yu <fenghua.yu@intel.com> Cc: Ralf Baechle <ralf@linux-mips.org> Cc: Benjamin Herrenschmidt <benh@kernel.crashing.org> Cc: Paul Mackerras <paulus@samba.org> Cc: Paul Mundt <lethal@linux-sh.org> Cc: "David S. Miller" <davem@davemloft.net> Cc: Chris Metcalf <cmetcalf@tilera.com> Cc: Thomas Gleixner <tglx@linutronix.de> Cc: Ingo Molnar <mingo@redhat.com> Cc: "H. Peter Anvin" <hpa@zytor.com> Cc: Martin Schwidefsky <schwidefsky@de.ibm.com> Cc: Heiko Carstens <heiko.carstens@de.ibm.com> Signed-off-by:
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Josh Triplett authored
drop_caches.c provides code only invokable via sysctl, so don't compile it in when CONFIG_SYSCTL=n. Signed-off-by:
Josh Triplett <josh@joshtriplett.org> Acked-by:
Kees Cook <keescook@chromium.org> Signed-off-by:
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Michal Hocko authored
Now that we have generic and well ordered cgroup tree walkers there is no need to keep css_get_next in the place. Signed-off-by:
KAMEZAWA Hiroyuki <kamezawa.hiroyu@jp.fujitsu.com> Acked-by:
Li Zefan <lizefan@huawei.com> Cc: Johannes Weiner <hannes@cmpxchg.org> Cc: Ying Han <yinghan@google.com> Cc: Tejun Heo <htejun@gmail.com> Cc: Glauber Costa <glommer@parallels.com> Signed-off-by:
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Michal Hocko authored
mem_cgroup_iter basically does two things currently. It takes care of the house keeping (reference counting, raclaim cookie) and it iterates through a hierarchy tree (by using cgroup generic tree walk). The code would be much more easier to follow if we move the iteration outside of the function (to __mem_cgrou_iter_next) so the distinction is more clear. This patch doesn't introduce any functional changes. Signed-off-by:
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Michal Hocko authored
The current implementation of mem_cgroup_iter has to consider both css and memcg to find out whether no group has been found (css==NULL - aka the loop is completed) and that no memcg is associated with the found node (!memcg - aka css_tryget failed because the group is no longer alive). This leads to awkward tweaks like tests for css && !memcg to skip the current node. It will be much easier if we got rid off css variable altogether and only rely on memcg. In order to do that the iteration part has to skip dead nodes. This sounds natural to me and as a nice side effect we will get a simple invariant that memcg is always alive when non-NULL and all nodes have been visited otherwise. We could get rid of the surrounding while loop but keep it in for now to make review easier. It will go away in the following patch. Signed-off-by:
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Michal Hocko authored
Now that the per-node-zone-priority iterator caches memory cgroups rather than their css ids we have to be careful and remove them from the iterator when they are on the way out otherwise they might live for unbounded amount of time even though their group is already gone (until the global/targeted reclaim triggers the zone under priority to find out the group is dead and let it to find the final rest). We can fix this issue by relaxing rules for the last_visited memcg. Instead of taking a reference to the css before it is stored into iter->last_visited we can just store its pointer and track the number of removed groups from each memcg's subhierarchy. This number would be stored into iterator everytime when a memcg is cached. If the iter count doesn't match the curent walker root's one we will start from the root again. The group counter is incremented upwards the hierarchy every time a group is removed. The iter_lock can be dropped because racing iterators cannot leak the reference anymore as the reference count is not elevated for last_visited when it is cached. Locking rules got a bit complicated by this change though. The iterator primarily relies on rcu read lock which makes sure that once we see a valid last_visited pointer then it will be valid for the whole RCU walk. smp_rmb makes sure that dead_count is read before last_visited and last_dead_count while smp_wmb makes sure that last_visited is updated before last_dead_count so the up-to-date last_dead_count cannot point to an outdated last_visited. css_tryget then makes sure that the last_visited is still alive in case the iteration races with the cached group removal (css is invalidated before mem_cgroup_css_offline increments dead_count). In short: mem_cgroup_iter rcu_read_lock() dead_count = atomic_read(parent->dead_count) smp_rmb() if (dead_count != iter->last_dead_count) last_visited POSSIBLY INVALID -> last_visited = NULL if (!css_tryget(iter->last_visited)) last_visited DEAD -> last_visited = NULL next = find_next(last_visited) css_tryget(next) css_put(last_visited) // css would be invalidated and parent->dead_count // incremented if this was the last reference iter->last_visited = next smp_wmb() iter->last_dead_count = dead_count rcu_read_unlock() cgroup_rmdir cgroup_destroy_locked atomic_add(CSS_DEACT_BIAS, &css->refcnt) // subsequent css_tryget fail mem_cgroup_css_offline mem_cgroup_invalidate_reclaim_iterators while(parent = parent_mem_cgroup) atomic_inc(parent->dead_count) css_put(css) // last reference held by cgroup core Spotted by Ying Han. Original idea from Johannes Weiner. [akpm@linux-foundation.org: coding-style fixes] Signed-off-by: -
Michal Hocko authored
mem_cgroup_iter curently relies on css->id when walking down a group hierarchy tree. This is really awkward because the tree walk depends on the groups creation ordering. The only guarantee is that a parent node is visited before its children. Example: 1) mkdir -p a a/d a/b/c 2) mkdir -a a/b/c a/d Will create the same trees but the tree walks will be different: 1) a, d, b, c 2) a, b, c, d Commit 574bd9f7 ("cgroup: implement generic child / descendant walk macros") has introduced generic cgroup tree walkers which provide either pre-order or post-order tree walk. This patch converts css->id based iteration to pre-order tree walk to keep the semantic with the original iterator where parent is always visited before its subtree. cgroup_for_each_descendant_pre suggests using post_create and pre_destroy for proper synchronization with groups addidition resp. removal. This implementation doesn't use those because a new memory cgroup is initialized sufficiently for iteration in mem_cgroup_css_alloc already and css reference counting enforces that the group is alive for both the last seen cgroup and the found one resp. it signals that the group is dead and it should be skipped. If the reclaim cookie is used we need to store the last visited group into the iterator so we have to be careful that it doesn't disappear in the mean time. Elevated reference count on the css keeps it alive even though the group have been removed (parked waiting for the last dput so that it can be freed). Per node-zone-prio iter_lock has been introduced to ensure that css_tryget and iter->last_visited is set atomically. Otherwise two racing walkers could both take a references and only one release it leading to a css leak (which pins cgroup dentry). Signed-off-by:
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Michal Hocko authored
The patchset tries to make mem_cgroup_iter saner in the way how it walks hierarchies. css->id based traversal is far from being ideal as it is not deterministic because it depends on the creation ordering. Additional to that css_id is considered a burden for cgroup maintainers because it is quite some code and memcg is the last user of it. After this series only the swap accounting uses css_id but that one will follow up later. Diffstat (if we exclude removed/added comments) looks quite promising. We got rid of some code: $ git diff mmotm... | grep -v "^[+-][[:space:]]*[/ ]\*" | diffstat b/include/linux/cgroup.h | 3 --- kernel/cgroup.c | 33 --------------------------------- mm/memcontrol.c | 4 +++- 3 files changed, 3 insertions(+), 37 deletions(-) The first patch is just preparatory and it changes when we release css of the previously returned memcg. Nothing controlversial. The second patch is the core of the patchset and it replaces css_get_next based on css_id by the generic cgroup pre-order. This brings some chalanges for the last visited group caching during the reclaim (mem_cgroup_per_zone::reclaim_iter). We have to use memcg pointers directly now which means that we have to keep a reference to those groups' css to keep them alive. I also folded iter_lock introduced by https://lkml.org/lkml/2013/1/3/295 in the previous version into this patch. Johannes felt the race I was describing should be mostly harmless and I haven't been able to trigger it so the lock doesn't deserve its own patch. It is still needed temporarily, though, because the reference counting on iter->last_visited depends on it. It will go away with the next patch. The next patch fixups an unbounded cgroup removal holdoff caused by the elevated css refcount. The issue has been observed by Ying Han. Johannes wasn't impressed by the previous version of the fix (https://lkml.org/lkml/2013/2/8/379) which cleaned up pending references during mem_cgroup_css_offline when a group is removed. He has suggested a different way when the iterator checks whether a cached memcg is still valid or no. More on that in the patch but the basic idea is that every memcg tracks the number removed subgroups and iterator records this number when a group is cached. These numbers are checked before iter->last_visited is about to be used and the iteration is restarted if it is invalid. The fourth and fifth patches are an attempt for simplification of the mem_cgroup_iter. css juggling is removed and the iteration logic is moved to a helper so that the reference counting and iteration are separated. The last patch just removes css_get_next as there is no user for it any longer. My testing looked as follows: A (use_hierarchy=1, limit_in_bytes=150M) /|\ 1 2 3 Children groups were created so that the number is never higher than 3 and their limits were random between 50-100M. Each group hosts a kernel build (starting with tar -xf so the tree is not shared and make -jNUM_CPUs/3) and terminated after random time - up to 5 minutes) and then it is removed. This should exercise both leaf and hierarchical reclaim as well as races with cgroup removals and debugging messages I added on top proved that. 100 groups were created during the test. This patch: css reference counting keeps the cgroup alive even though it has been already removed. mem_cgroup_iter relies on this fact and takes a reference to the returned group. The reference is then released on the next iteration or mem_cgroup_iter_break. mem_cgroup_iter currently releases the reference right after it gets the last css_id. This is correct because neither prev's memcg nor cgroup are accessed after then. This will change in the next patch so we need to hold the group alive a bit longer so let's move the css_put at the end of the function. Signed-off-by:
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Jiang Liu authored
Use helper function free_highmem_page() to free highmem pages into the buddy system. Signed-off-by:
Jiang Liu <jiang.liu@huawei.com> Cc: Thomas Gleixner <tglx@linutronix.de> Cc: Ingo Molnar <mingo@redhat.com> Cc: "H. Peter Anvin" <hpa@zytor.com> Cc: Cong Wang <amwang@redhat.com> Cc: Yinghai Lu <yinghai@kernel.org> Cc: Attilio Rao <attilio.rao@citrix.com> Cc: Konrad Rzeszutek Wilk <konrad.wilk@oracle.com> Reviewed-by:
Pekka Enberg <penberg@kernel.org> Signed-off-by:
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Jiang Liu authored
Use helper function free_highmem_page() to free highmem pages into the buddy system. Signed-off-by:
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Jiang Liu authored
Use helper function free_highmem_page() to free highmem pages into the buddy system. Signed-off-by:
Sam Ravnborg <sam@ravnborg.org> Signed-off-by:
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Jiang Liu authored
Use helper function free_highmem_page() to free highmem pages into the buddy system. Signed-off-by:
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Jiang Liu authored
Use helper function free_highmem_page() to free highmem pages into the buddy system. Signed-off-by:
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