2005-04-17 06:20:36 +08:00
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/*
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* linux/arch/i386/mm/pgtable.c
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*/
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#include <linux/config.h>
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#include <linux/sched.h>
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#include <linux/kernel.h>
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#include <linux/errno.h>
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#include <linux/mm.h>
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#include <linux/swap.h>
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#include <linux/smp.h>
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#include <linux/highmem.h>
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#include <linux/slab.h>
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#include <linux/pagemap.h>
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#include <linux/spinlock.h>
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#include <asm/system.h>
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#include <asm/pgtable.h>
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#include <asm/pgalloc.h>
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#include <asm/fixmap.h>
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#include <asm/e820.h>
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#include <asm/tlb.h>
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#include <asm/tlbflush.h>
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void show_mem(void)
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{
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int total = 0, reserved = 0;
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int shared = 0, cached = 0;
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int highmem = 0;
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struct page *page;
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pg_data_t *pgdat;
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unsigned long i;
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2005-06-23 15:08:08 +08:00
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struct page_state ps;
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2005-10-30 09:16:52 +08:00
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unsigned long flags;
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2005-04-17 06:20:36 +08:00
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2005-06-26 05:59:24 +08:00
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printk(KERN_INFO "Mem-info:\n");
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2005-04-17 06:20:36 +08:00
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show_free_areas();
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2005-06-26 05:59:24 +08:00
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printk(KERN_INFO "Free swap: %6ldkB\n", nr_swap_pages<<(PAGE_SHIFT-10));
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2006-03-27 17:15:59 +08:00
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for_each_online_pgdat(pgdat) {
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2005-10-30 09:16:52 +08:00
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pgdat_resize_lock(pgdat, &flags);
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2005-04-17 06:20:36 +08:00
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for (i = 0; i < pgdat->node_spanned_pages; ++i) {
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[PATCH] remove non-DISCONTIG use of pgdat->node_mem_map
This patch effectively eliminates direct use of pgdat->node_mem_map outside
of the DISCONTIG code. On a flat memory system, these fields aren't
currently used, neither are they on a sparsemem system.
There was also a node_mem_map(nid) macro on many architectures. Its use
along with the use of ->node_mem_map itself was not consistent. It has
been removed in favor of two new, more explicit, arch-independent macros:
pgdat_page_nr(pgdat, pagenr)
nid_page_nr(nid, pagenr)
I called them "pgdat" and "nid" because we overload the term "node" to mean
"NUMA node", "DISCONTIG node" or "pg_data_t" in very confusing ways. I
believe the newer names are much clearer.
These macros can be overridden in the sparsemem case with a theoretically
slower operation using node_start_pfn and pfn_to_page(), instead. We could
make this the only behavior if people want, but I don't want to change too
much at once. One thing at a time.
This patch removes more code than it adds.
Compile tested on alpha, alpha discontig, arm, arm-discontig, i386, i386
generic, NUMAQ, Summit, ppc64, ppc64 discontig, and x86_64. Full list
here: http://sr71.net/patches/2.6.12/2.6.12-rc1-mhp2/configs/
Boot tested on NUMAQ, x86 SMP and ppc64 power4/5 LPARs.
Signed-off-by: Dave Hansen <haveblue@us.ibm.com>
Signed-off-by: Martin J. Bligh <mbligh@aracnet.com>
Signed-off-by: Andrew Morton <akpm@osdl.org>
Signed-off-by: Linus Torvalds <torvalds@osdl.org>
2005-06-23 15:07:37 +08:00
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page = pgdat_page_nr(pgdat, i);
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2005-04-17 06:20:36 +08:00
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total++;
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if (PageHighMem(page))
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highmem++;
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if (PageReserved(page))
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reserved++;
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else if (PageSwapCache(page))
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cached++;
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else if (page_count(page))
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shared += page_count(page) - 1;
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}
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2005-10-30 09:16:52 +08:00
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pgdat_resize_unlock(pgdat, &flags);
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2005-04-17 06:20:36 +08:00
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}
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2005-06-26 05:59:24 +08:00
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printk(KERN_INFO "%d pages of RAM\n", total);
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printk(KERN_INFO "%d pages of HIGHMEM\n", highmem);
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printk(KERN_INFO "%d reserved pages\n", reserved);
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printk(KERN_INFO "%d pages shared\n", shared);
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printk(KERN_INFO "%d pages swap cached\n", cached);
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2005-06-23 15:08:08 +08:00
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get_page_state(&ps);
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2005-06-26 05:59:24 +08:00
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printk(KERN_INFO "%lu pages dirty\n", ps.nr_dirty);
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printk(KERN_INFO "%lu pages writeback\n", ps.nr_writeback);
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2006-06-30 16:55:34 +08:00
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printk(KERN_INFO "%lu pages mapped\n", global_page_state(NR_FILE_MAPPED));
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2005-06-26 05:59:24 +08:00
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printk(KERN_INFO "%lu pages slab\n", ps.nr_slab);
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printk(KERN_INFO "%lu pages pagetables\n", ps.nr_page_table_pages);
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2005-04-17 06:20:36 +08:00
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}
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/*
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* Associate a virtual page frame with a given physical page frame
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* and protection flags for that frame.
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*/
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static void set_pte_pfn(unsigned long vaddr, unsigned long pfn, pgprot_t flags)
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{
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pgd_t *pgd;
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pud_t *pud;
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pmd_t *pmd;
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pte_t *pte;
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pgd = swapper_pg_dir + pgd_index(vaddr);
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if (pgd_none(*pgd)) {
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BUG();
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return;
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}
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pud = pud_offset(pgd, vaddr);
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if (pud_none(*pud)) {
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BUG();
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return;
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}
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pmd = pmd_offset(pud, vaddr);
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if (pmd_none(*pmd)) {
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BUG();
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return;
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}
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pte = pte_offset_kernel(pmd, vaddr);
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/* <pfn,flags> stored as-is, to permit clearing entries */
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set_pte(pte, pfn_pte(pfn, flags));
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/*
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* It's enough to flush this one mapping.
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* (PGE mappings get flushed as well)
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*/
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__flush_tlb_one(vaddr);
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}
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/*
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* Associate a large virtual page frame with a given physical page frame
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* and protection flags for that frame. pfn is for the base of the page,
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* vaddr is what the page gets mapped to - both must be properly aligned.
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* The pmd must already be instantiated. Assumes PAE mode.
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*/
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void set_pmd_pfn(unsigned long vaddr, unsigned long pfn, pgprot_t flags)
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{
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pgd_t *pgd;
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pud_t *pud;
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pmd_t *pmd;
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if (vaddr & (PMD_SIZE-1)) { /* vaddr is misaligned */
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2005-06-26 05:59:24 +08:00
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printk(KERN_WARNING "set_pmd_pfn: vaddr misaligned\n");
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2005-04-17 06:20:36 +08:00
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return; /* BUG(); */
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}
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if (pfn & (PTRS_PER_PTE-1)) { /* pfn is misaligned */
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2005-06-26 05:59:24 +08:00
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printk(KERN_WARNING "set_pmd_pfn: pfn misaligned\n");
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2005-04-17 06:20:36 +08:00
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return; /* BUG(); */
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}
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pgd = swapper_pg_dir + pgd_index(vaddr);
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if (pgd_none(*pgd)) {
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2005-06-26 05:59:24 +08:00
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printk(KERN_WARNING "set_pmd_pfn: pgd_none\n");
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2005-04-17 06:20:36 +08:00
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return; /* BUG(); */
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}
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pud = pud_offset(pgd, vaddr);
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pmd = pmd_offset(pud, vaddr);
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set_pmd(pmd, pfn_pmd(pfn, flags));
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/*
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* It's enough to flush this one mapping.
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* (PGE mappings get flushed as well)
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*/
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__flush_tlb_one(vaddr);
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}
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void __set_fixmap (enum fixed_addresses idx, unsigned long phys, pgprot_t flags)
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{
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unsigned long address = __fix_to_virt(idx);
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if (idx >= __end_of_fixed_addresses) {
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BUG();
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return;
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}
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set_pte_pfn(address, phys >> PAGE_SHIFT, flags);
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}
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pte_t *pte_alloc_one_kernel(struct mm_struct *mm, unsigned long address)
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{
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return (pte_t *)__get_free_page(GFP_KERNEL|__GFP_REPEAT|__GFP_ZERO);
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}
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struct page *pte_alloc_one(struct mm_struct *mm, unsigned long address)
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{
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struct page *pte;
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#ifdef CONFIG_HIGHPTE
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pte = alloc_pages(GFP_KERNEL|__GFP_HIGHMEM|__GFP_REPEAT|__GFP_ZERO, 0);
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#else
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pte = alloc_pages(GFP_KERNEL|__GFP_REPEAT|__GFP_ZERO, 0);
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#endif
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return pte;
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}
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void pmd_ctor(void *pmd, kmem_cache_t *cache, unsigned long flags)
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{
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memset(pmd, 0, PTRS_PER_PMD*sizeof(pmd_t));
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}
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/*
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* List of all pgd's needed for non-PAE so it can invalidate entries
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* in both cached and uncached pgd's; not needed for PAE since the
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* kernel pmd is shared. If PAE were not to share the pmd a similar
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* tactic would be needed. This is essentially codepath-based locking
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* against pageattr.c; it is the unique case in which a valid change
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* of kernel pagetables can't be lazily synchronized by vmalloc faults.
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* vmalloc faults work because attached pagetables are never freed.
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* The locking scheme was chosen on the basis of manfred's
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* recommendations and having no core impact whatsoever.
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* -- wli
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*/
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DEFINE_SPINLOCK(pgd_lock);
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struct page *pgd_list;
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static inline void pgd_list_add(pgd_t *pgd)
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{
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struct page *page = virt_to_page(pgd);
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page->index = (unsigned long)pgd_list;
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if (pgd_list)
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[PATCH] mm: split page table lock
Christoph Lameter demonstrated very poor scalability on the SGI 512-way, with
a many-threaded application which concurrently initializes different parts of
a large anonymous area.
This patch corrects that, by using a separate spinlock per page table page, to
guard the page table entries in that page, instead of using the mm's single
page_table_lock. (But even then, page_table_lock is still used to guard page
table allocation, and anon_vma allocation.)
In this implementation, the spinlock is tucked inside the struct page of the
page table page: with a BUILD_BUG_ON in case it overflows - which it would in
the case of 32-bit PA-RISC with spinlock debugging enabled.
Splitting the lock is not quite for free: another cacheline access. Ideally,
I suppose we would use split ptlock only for multi-threaded processes on
multi-cpu machines; but deciding that dynamically would have its own costs.
So for now enable it by config, at some number of cpus - since the Kconfig
language doesn't support inequalities, let preprocessor compare that with
NR_CPUS. But I don't think it's worth being user-configurable: for good
testing of both split and unsplit configs, split now at 4 cpus, and perhaps
change that to 8 later.
There is a benefit even for singly threaded processes: kswapd can be attacking
one part of the mm while another part is busy faulting.
Signed-off-by: Hugh Dickins <hugh@veritas.com>
Signed-off-by: Andrew Morton <akpm@osdl.org>
Signed-off-by: Linus Torvalds <torvalds@osdl.org>
2005-10-30 09:16:40 +08:00
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set_page_private(pgd_list, (unsigned long)&page->index);
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2005-04-17 06:20:36 +08:00
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pgd_list = page;
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[PATCH] mm: split page table lock
Christoph Lameter demonstrated very poor scalability on the SGI 512-way, with
a many-threaded application which concurrently initializes different parts of
a large anonymous area.
This patch corrects that, by using a separate spinlock per page table page, to
guard the page table entries in that page, instead of using the mm's single
page_table_lock. (But even then, page_table_lock is still used to guard page
table allocation, and anon_vma allocation.)
In this implementation, the spinlock is tucked inside the struct page of the
page table page: with a BUILD_BUG_ON in case it overflows - which it would in
the case of 32-bit PA-RISC with spinlock debugging enabled.
Splitting the lock is not quite for free: another cacheline access. Ideally,
I suppose we would use split ptlock only for multi-threaded processes on
multi-cpu machines; but deciding that dynamically would have its own costs.
So for now enable it by config, at some number of cpus - since the Kconfig
language doesn't support inequalities, let preprocessor compare that with
NR_CPUS. But I don't think it's worth being user-configurable: for good
testing of both split and unsplit configs, split now at 4 cpus, and perhaps
change that to 8 later.
There is a benefit even for singly threaded processes: kswapd can be attacking
one part of the mm while another part is busy faulting.
Signed-off-by: Hugh Dickins <hugh@veritas.com>
Signed-off-by: Andrew Morton <akpm@osdl.org>
Signed-off-by: Linus Torvalds <torvalds@osdl.org>
2005-10-30 09:16:40 +08:00
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set_page_private(page, (unsigned long)&pgd_list);
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2005-04-17 06:20:36 +08:00
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}
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static inline void pgd_list_del(pgd_t *pgd)
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{
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struct page *next, **pprev, *page = virt_to_page(pgd);
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next = (struct page *)page->index;
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[PATCH] mm: split page table lock
Christoph Lameter demonstrated very poor scalability on the SGI 512-way, with
a many-threaded application which concurrently initializes different parts of
a large anonymous area.
This patch corrects that, by using a separate spinlock per page table page, to
guard the page table entries in that page, instead of using the mm's single
page_table_lock. (But even then, page_table_lock is still used to guard page
table allocation, and anon_vma allocation.)
In this implementation, the spinlock is tucked inside the struct page of the
page table page: with a BUILD_BUG_ON in case it overflows - which it would in
the case of 32-bit PA-RISC with spinlock debugging enabled.
Splitting the lock is not quite for free: another cacheline access. Ideally,
I suppose we would use split ptlock only for multi-threaded processes on
multi-cpu machines; but deciding that dynamically would have its own costs.
So for now enable it by config, at some number of cpus - since the Kconfig
language doesn't support inequalities, let preprocessor compare that with
NR_CPUS. But I don't think it's worth being user-configurable: for good
testing of both split and unsplit configs, split now at 4 cpus, and perhaps
change that to 8 later.
There is a benefit even for singly threaded processes: kswapd can be attacking
one part of the mm while another part is busy faulting.
Signed-off-by: Hugh Dickins <hugh@veritas.com>
Signed-off-by: Andrew Morton <akpm@osdl.org>
Signed-off-by: Linus Torvalds <torvalds@osdl.org>
2005-10-30 09:16:40 +08:00
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pprev = (struct page **)page_private(page);
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2005-04-17 06:20:36 +08:00
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*pprev = next;
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if (next)
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[PATCH] mm: split page table lock
Christoph Lameter demonstrated very poor scalability on the SGI 512-way, with
a many-threaded application which concurrently initializes different parts of
a large anonymous area.
This patch corrects that, by using a separate spinlock per page table page, to
guard the page table entries in that page, instead of using the mm's single
page_table_lock. (But even then, page_table_lock is still used to guard page
table allocation, and anon_vma allocation.)
In this implementation, the spinlock is tucked inside the struct page of the
page table page: with a BUILD_BUG_ON in case it overflows - which it would in
the case of 32-bit PA-RISC with spinlock debugging enabled.
Splitting the lock is not quite for free: another cacheline access. Ideally,
I suppose we would use split ptlock only for multi-threaded processes on
multi-cpu machines; but deciding that dynamically would have its own costs.
So for now enable it by config, at some number of cpus - since the Kconfig
language doesn't support inequalities, let preprocessor compare that with
NR_CPUS. But I don't think it's worth being user-configurable: for good
testing of both split and unsplit configs, split now at 4 cpus, and perhaps
change that to 8 later.
There is a benefit even for singly threaded processes: kswapd can be attacking
one part of the mm while another part is busy faulting.
Signed-off-by: Hugh Dickins <hugh@veritas.com>
Signed-off-by: Andrew Morton <akpm@osdl.org>
Signed-off-by: Linus Torvalds <torvalds@osdl.org>
2005-10-30 09:16:40 +08:00
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set_page_private(next, (unsigned long)pprev);
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2005-04-17 06:20:36 +08:00
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}
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void pgd_ctor(void *pgd, kmem_cache_t *cache, unsigned long unused)
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{
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unsigned long flags;
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2005-09-04 06:56:50 +08:00
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if (PTRS_PER_PMD == 1) {
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memset(pgd, 0, USER_PTRS_PER_PGD*sizeof(pgd_t));
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2005-04-17 06:20:36 +08:00
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spin_lock_irqsave(&pgd_lock, flags);
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2005-09-04 06:56:50 +08:00
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}
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2005-04-17 06:20:36 +08:00
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2005-09-04 06:56:50 +08:00
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clone_pgd_range((pgd_t *)pgd + USER_PTRS_PER_PGD,
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2005-04-17 06:20:36 +08:00
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swapper_pg_dir + USER_PTRS_PER_PGD,
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2005-09-04 06:56:50 +08:00
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KERNEL_PGD_PTRS);
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2005-04-17 06:20:36 +08:00
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if (PTRS_PER_PMD > 1)
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return;
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pgd_list_add(pgd);
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spin_unlock_irqrestore(&pgd_lock, flags);
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}
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/* never called when PTRS_PER_PMD > 1 */
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void pgd_dtor(void *pgd, kmem_cache_t *cache, unsigned long unused)
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{
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unsigned long flags; /* can be called from interrupt context */
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|
|
|
|
|
spin_lock_irqsave(&pgd_lock, flags);
|
|
|
|
pgd_list_del(pgd);
|
|
|
|
spin_unlock_irqrestore(&pgd_lock, flags);
|
|
|
|
}
|
|
|
|
|
|
|
|
pgd_t *pgd_alloc(struct mm_struct *mm)
|
|
|
|
{
|
|
|
|
int i;
|
|
|
|
pgd_t *pgd = kmem_cache_alloc(pgd_cache, GFP_KERNEL);
|
|
|
|
|
|
|
|
if (PTRS_PER_PMD == 1 || !pgd)
|
|
|
|
return pgd;
|
|
|
|
|
|
|
|
for (i = 0; i < USER_PTRS_PER_PGD; ++i) {
|
|
|
|
pmd_t *pmd = kmem_cache_alloc(pmd_cache, GFP_KERNEL);
|
|
|
|
if (!pmd)
|
|
|
|
goto out_oom;
|
|
|
|
set_pgd(&pgd[i], __pgd(1 + __pa(pmd)));
|
|
|
|
}
|
|
|
|
return pgd;
|
|
|
|
|
|
|
|
out_oom:
|
|
|
|
for (i--; i >= 0; i--)
|
|
|
|
kmem_cache_free(pmd_cache, (void *)__va(pgd_val(pgd[i])-1));
|
|
|
|
kmem_cache_free(pgd_cache, pgd);
|
|
|
|
return NULL;
|
|
|
|
}
|
|
|
|
|
|
|
|
void pgd_free(pgd_t *pgd)
|
|
|
|
{
|
|
|
|
int i;
|
|
|
|
|
|
|
|
/* in the PAE case user pgd entries are overwritten before usage */
|
|
|
|
if (PTRS_PER_PMD > 1)
|
|
|
|
for (i = 0; i < USER_PTRS_PER_PGD; ++i)
|
|
|
|
kmem_cache_free(pmd_cache, (void *)__va(pgd_val(pgd[i])-1));
|
[PATCH] freepgt: free_pgtables use vma list
Recent woes with some arches needing their own pgd_addr_end macro; and 4-level
clear_page_range regression since 2.6.10's clear_page_tables; and its
long-standing well-known inefficiency in searching throughout the higher-level
page tables for those few entries to clear and free: all can be blamed on
ignoring the list of vmas when we free page tables.
Replace exit_mmap's clear_page_range of the total user address space by
free_pgtables operating on the mm's vma list; unmap_region use it in the same
way, giving floor and ceiling beyond which it may not free tables. This
brings lmbench fork/exec/sh numbers back to 2.6.10 (unless preempt is enabled,
in which case latency fixes spoil unmap_vmas throughput).
Beware: the do_mmap_pgoff driver failure case must now use unmap_region
instead of zap_page_range, since a page table might have been allocated, and
can only be freed while it is touched by some vma.
Move free_pgtables from mmap.c to memory.c, where its lower levels are adapted
from the clear_page_range levels. (Most of free_pgtables' old code was
actually for a non-existent case, prev not properly set up, dating from before
hch gave us split_vma.) Pass mmu_gather** in the public interfaces, since we
might want to add latency lockdrops later; but no attempt to do so yet, going
by vma should itself reduce latency.
But what if is_hugepage_only_range? Those ia64 and ppc64 cases need careful
examination: put that off until a later patch of the series.
What of x86_64's 32bit vdso page __map_syscall32 maps outside any vma?
And the range to sparc64's flush_tlb_pgtables? It's less clear to me now that
we need to do more than is done here - every PMD_SIZE ever occupied will be
flushed, do we really have to flush every PGDIR_SIZE ever partially occupied?
A shame to complicate it unnecessarily.
Special thanks to David Miller for time spent repairing my ceilings.
Signed-off-by: Hugh Dickins <hugh@veritas.com>
Signed-off-by: Andrew Morton <akpm@osdl.org>
Signed-off-by: Linus Torvalds <torvalds@osdl.org>
2005-04-20 04:29:15 +08:00
|
|
|
/* in the non-PAE case, free_pgtables() clears user pgd entries */
|
2005-04-17 06:20:36 +08:00
|
|
|
kmem_cache_free(pgd_cache, pgd);
|
|
|
|
}
|