linux/arch/s390/mm/pgalloc.c

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License cleanup: add SPDX GPL-2.0 license identifier to files with no license Many source files in the tree are missing licensing information, which makes it harder for compliance tools to determine the correct license. By default all files without license information are under the default license of the kernel, which is GPL version 2. Update the files which contain no license information with the 'GPL-2.0' SPDX license identifier. The SPDX identifier is a legally binding shorthand, which can be used instead of the full boiler plate text. This patch is based on work done by Thomas Gleixner and Kate Stewart and Philippe Ombredanne. How this work was done: Patches were generated and checked against linux-4.14-rc6 for a subset of the use cases: - file had no licensing information it it. - file was a */uapi/* one with no licensing information in it, - file was a */uapi/* one with existing licensing information, Further patches will be generated in subsequent months to fix up cases where non-standard license headers were used, and references to license had to be inferred by heuristics based on keywords. The analysis to determine which SPDX License Identifier to be applied to a file was done in a spreadsheet of side by side results from of the output of two independent scanners (ScanCode & Windriver) producing SPDX tag:value files created by Philippe Ombredanne. Philippe prepared the base worksheet, and did an initial spot review of a few 1000 files. The 4.13 kernel was the starting point of the analysis with 60,537 files assessed. Kate Stewart did a file by file comparison of the scanner results in the spreadsheet to determine which SPDX license identifier(s) to be applied to the file. She confirmed any determination that was not immediately clear with lawyers working with the Linux Foundation. Criteria used to select files for SPDX license identifier tagging was: - Files considered eligible had to be source code files. - Make and config files were included as candidates if they contained >5 lines of source - File already had some variant of a license header in it (even if <5 lines). All documentation files were explicitly excluded. The following heuristics were used to determine which SPDX license identifiers to apply. - when both scanners couldn't find any license traces, file was considered to have no license information in it, and the top level COPYING file license applied. For non */uapi/* files that summary was: SPDX license identifier # files ---------------------------------------------------|------- GPL-2.0 11139 and resulted in the first patch in this series. If that file was a */uapi/* path one, it was "GPL-2.0 WITH Linux-syscall-note" otherwise it was "GPL-2.0". Results of that was: SPDX license identifier # files ---------------------------------------------------|------- GPL-2.0 WITH Linux-syscall-note 930 and resulted in the second patch in this series. - if a file had some form of licensing information in it, and was one of the */uapi/* ones, it was denoted with the Linux-syscall-note if any GPL family license was found in the file or had no licensing in it (per prior point). Results summary: SPDX license identifier # files ---------------------------------------------------|------ GPL-2.0 WITH Linux-syscall-note 270 GPL-2.0+ WITH Linux-syscall-note 169 ((GPL-2.0 WITH Linux-syscall-note) OR BSD-2-Clause) 21 ((GPL-2.0 WITH Linux-syscall-note) OR BSD-3-Clause) 17 LGPL-2.1+ WITH Linux-syscall-note 15 GPL-1.0+ WITH Linux-syscall-note 14 ((GPL-2.0+ WITH Linux-syscall-note) OR BSD-3-Clause) 5 LGPL-2.0+ WITH Linux-syscall-note 4 LGPL-2.1 WITH Linux-syscall-note 3 ((GPL-2.0 WITH Linux-syscall-note) OR MIT) 3 ((GPL-2.0 WITH Linux-syscall-note) AND MIT) 1 and that resulted in the third patch in this series. - when the two scanners agreed on the detected license(s), that became the concluded license(s). - when there was disagreement between the two scanners (one detected a license but the other didn't, or they both detected different licenses) a manual inspection of the file occurred. - In most cases a manual inspection of the information in the file resulted in a clear resolution of the license that should apply (and which scanner probably needed to revisit its heuristics). - When it was not immediately clear, the license identifier was confirmed with lawyers working with the Linux Foundation. - If there was any question as to the appropriate license identifier, the file was flagged for further research and to be revisited later in time. In total, over 70 hours of logged manual review was done on the spreadsheet to determine the SPDX license identifiers to apply to the source files by Kate, Philippe, Thomas and, in some cases, confirmation by lawyers working with the Linux Foundation. Kate also obtained a third independent scan of the 4.13 code base from FOSSology, and compared selected files where the other two scanners disagreed against that SPDX file, to see if there was new insights. The Windriver scanner is based on an older version of FOSSology in part, so they are related. Thomas did random spot checks in about 500 files from the spreadsheets for the uapi headers and agreed with SPDX license identifier in the files he inspected. For the non-uapi files Thomas did random spot checks in about 15000 files. In initial set of patches against 4.14-rc6, 3 files were found to have copy/paste license identifier errors, and have been fixed to reflect the correct identifier. Additionally Philippe spent 10 hours this week doing a detailed manual inspection and review of the 12,461 patched files from the initial patch version early this week with: - a full scancode scan run, collecting the matched texts, detected license ids and scores - reviewing anything where there was a license detected (about 500+ files) to ensure that the applied SPDX license was correct - reviewing anything where there was no detection but the patch license was not GPL-2.0 WITH Linux-syscall-note to ensure that the applied SPDX license was correct This produced a worksheet with 20 files needing minor correction. This worksheet was then exported into 3 different .csv files for the different types of files to be modified. These .csv files were then reviewed by Greg. Thomas wrote a script to parse the csv files and add the proper SPDX tag to the file, in the format that the file expected. This script was further refined by Greg based on the output to detect more types of files automatically and to distinguish between header and source .c files (which need different comment types.) Finally Greg ran the script using the .csv files to generate the patches. Reviewed-by: Kate Stewart <kstewart@linuxfoundation.org> Reviewed-by: Philippe Ombredanne <pombredanne@nexb.com> Reviewed-by: Thomas Gleixner <tglx@linutronix.de> Signed-off-by: Greg Kroah-Hartman <gregkh@linuxfoundation.org>
2017-11-01 14:07:57 +00:00
// SPDX-License-Identifier: GPL-2.0
/*
* Page table allocation functions
*
* Copyright IBM Corp. 2016
* Author(s): Martin Schwidefsky <schwidefsky@de.ibm.com>
*/
#include <linux/sysctl.h>
#include <linux/slab.h>
#include <linux/mm.h>
#include <asm/mmu_context.h>
#include <asm/pgalloc.h>
#include <asm/gmap.h>
#include <asm/tlb.h>
#include <asm/tlbflush.h>
#ifdef CONFIG_PGSTE
int page_table_allocate_pgste = 0;
EXPORT_SYMBOL(page_table_allocate_pgste);
static struct ctl_table page_table_sysctl[] = {
{
.procname = "allocate_pgste",
.data = &page_table_allocate_pgste,
.maxlen = sizeof(int),
.mode = S_IRUGO | S_IWUSR,
.proc_handler = proc_dointvec_minmax,
.extra1 = SYSCTL_ZERO,
.extra2 = SYSCTL_ONE,
},
{ }
};
static struct ctl_table page_table_sysctl_dir[] = {
{
.procname = "vm",
.maxlen = 0,
.mode = 0555,
.child = page_table_sysctl,
},
{ }
};
static int __init page_table_register_sysctl(void)
{
return register_sysctl_table(page_table_sysctl_dir) ? 0 : -ENOMEM;
}
__initcall(page_table_register_sysctl);
#endif /* CONFIG_PGSTE */
unsigned long *crst_table_alloc(struct mm_struct *mm)
{
struct page *page = alloc_pages(GFP_KERNEL, 2);
if (!page)
return NULL;
arch_set_page_dat(page, 2);
return (unsigned long *) page_to_virt(page);
}
void crst_table_free(struct mm_struct *mm, unsigned long *table)
{
free_pages((unsigned long) table, 2);
}
static void __crst_table_upgrade(void *arg)
{
struct mm_struct *mm = arg;
s390/mm: remove set_fs / rework address space handling Remove set_fs support from s390. With doing this rework address space handling and simplify it. As a result address spaces are now setup like this: CPU running in | %cr1 ASCE | %cr7 ASCE | %cr13 ASCE ----------------------------|-----------|-----------|----------- user space | user | user | kernel kernel, normal execution | kernel | user | kernel kernel, kvm guest execution | gmap | user | kernel To achieve this the getcpu vdso syscall is removed in order to avoid secondary address mode and a separate vdso address space in for user space. The getcpu vdso syscall will be implemented differently with a subsequent patch. The kernel accesses user space always via secondary address space. This happens in different ways: - with mvcos in home space mode and directly read/write to secondary address space - with mvcs/mvcp in primary space mode and copy from primary space to secondary space or vice versa - with e.g. cs in secondary space mode and access secondary space Switching translation modes happens with sacf before and after instructions which access user space, like before. Lazy handling of control register reloading is removed in the hope to make everything simpler, but at the cost of making kernel entry and exit a bit slower. That is: on kernel entry the primary asce is always changed to contain the kernel asce, and on kernel exit the primary asce is changed again so it contains the user asce. In kernel mode there is only one exception to the primary asce: when kvm guests are executed the primary asce contains the gmap asce (which describes the guest address space). The primary asce is reset to kernel asce whenever kvm guest execution is interrupted, so that this doesn't has to be taken into account for any user space accesses. Reviewed-by: Sven Schnelle <svens@linux.ibm.com> Signed-off-by: Heiko Carstens <hca@linux.ibm.com>
2020-11-16 07:06:40 +00:00
/* change all active ASCEs to avoid the creation of new TLBs */
s390/mm: fix page table upgrade vs 2ndary address mode accesses A page table upgrade in a kernel section that uses secondary address mode will mess up the kernel instructions as follows: Consider the following scenario: two threads are sharing memory. On CPU1 thread 1 does e.g. strnlen_user(). That gets to old_fs = enable_sacf_uaccess(); len = strnlen_user_srst(src, size); and " la %2,0(%1)\n" " la %3,0(%0,%1)\n" " slgr %0,%0\n" " sacf 256\n" "0: srst %3,%2\n" in strnlen_user_srst(). At that point we are in secondary space mode, control register 1 points to kernel page table and instruction fetching happens via c1, rather than usual c13. Interrupts are not disabled, for obvious reasons. On CPU2 thread 2 does MAP_FIXED mmap(), forcing the upgrade of page table from 3-level to e.g. 4-level one. We'd allocated new top-level table, set it up and now we hit this: notify = 1; spin_unlock_bh(&mm->page_table_lock); } if (notify) on_each_cpu(__crst_table_upgrade, mm, 0); OK, we need to actually change over to use of new page table and we need that to happen in all threads that are currently running. Which happens to include the thread 1. IPI is delivered and we have static void __crst_table_upgrade(void *arg) { struct mm_struct *mm = arg; if (current->active_mm == mm) set_user_asce(mm); __tlb_flush_local(); } run on CPU1. That does static inline void set_user_asce(struct mm_struct *mm) { S390_lowcore.user_asce = mm->context.asce; OK, user page table address updated... __ctl_load(S390_lowcore.user_asce, 1, 1); ... and control register 1 set to it. clear_cpu_flag(CIF_ASCE_PRIMARY); } IPI is run in home space mode, so it's fine - insns are fetched using c13, which always points to kernel page table. But as soon as we return from the interrupt, previous PSW is restored, putting CPU1 back into secondary space mode, at which point we no longer get the kernel instructions from the kernel mapping. The fix is to only fixup the control registers that are currently in use for user processes during the page table update. We must also disable interrupts in enable_sacf_uaccess to synchronize the cr and thread.mm_segment updates against the on_each-cpu. Fixes: 0aaba41b58bc ("s390: remove all code using the access register mode") Cc: stable@vger.kernel.org # 4.15+ Reported-by: Al Viro <viro@zeniv.linux.org.uk> Reviewed-by: Gerald Schaefer <gerald.schaefer@de.ibm.com> References: CVE-2020-11884 Signed-off-by: Christian Borntraeger <borntraeger@de.ibm.com>
2020-04-15 13:21:01 +00:00
if (current->active_mm == mm) {
S390_lowcore.user_asce = mm->context.asce;
s390/mm: remove set_fs / rework address space handling Remove set_fs support from s390. With doing this rework address space handling and simplify it. As a result address spaces are now setup like this: CPU running in | %cr1 ASCE | %cr7 ASCE | %cr13 ASCE ----------------------------|-----------|-----------|----------- user space | user | user | kernel kernel, normal execution | kernel | user | kernel kernel, kvm guest execution | gmap | user | kernel To achieve this the getcpu vdso syscall is removed in order to avoid secondary address mode and a separate vdso address space in for user space. The getcpu vdso syscall will be implemented differently with a subsequent patch. The kernel accesses user space always via secondary address space. This happens in different ways: - with mvcos in home space mode and directly read/write to secondary address space - with mvcs/mvcp in primary space mode and copy from primary space to secondary space or vice versa - with e.g. cs in secondary space mode and access secondary space Switching translation modes happens with sacf before and after instructions which access user space, like before. Lazy handling of control register reloading is removed in the hope to make everything simpler, but at the cost of making kernel entry and exit a bit slower. That is: on kernel entry the primary asce is always changed to contain the kernel asce, and on kernel exit the primary asce is changed again so it contains the user asce. In kernel mode there is only one exception to the primary asce: when kvm guests are executed the primary asce contains the gmap asce (which describes the guest address space). The primary asce is reset to kernel asce whenever kvm guest execution is interrupted, so that this doesn't has to be taken into account for any user space accesses. Reviewed-by: Sven Schnelle <svens@linux.ibm.com> Signed-off-by: Heiko Carstens <hca@linux.ibm.com>
2020-11-16 07:06:40 +00:00
__ctl_load(S390_lowcore.user_asce, 7, 7);
s390/mm: fix page table upgrade vs 2ndary address mode accesses A page table upgrade in a kernel section that uses secondary address mode will mess up the kernel instructions as follows: Consider the following scenario: two threads are sharing memory. On CPU1 thread 1 does e.g. strnlen_user(). That gets to old_fs = enable_sacf_uaccess(); len = strnlen_user_srst(src, size); and " la %2,0(%1)\n" " la %3,0(%0,%1)\n" " slgr %0,%0\n" " sacf 256\n" "0: srst %3,%2\n" in strnlen_user_srst(). At that point we are in secondary space mode, control register 1 points to kernel page table and instruction fetching happens via c1, rather than usual c13. Interrupts are not disabled, for obvious reasons. On CPU2 thread 2 does MAP_FIXED mmap(), forcing the upgrade of page table from 3-level to e.g. 4-level one. We'd allocated new top-level table, set it up and now we hit this: notify = 1; spin_unlock_bh(&mm->page_table_lock); } if (notify) on_each_cpu(__crst_table_upgrade, mm, 0); OK, we need to actually change over to use of new page table and we need that to happen in all threads that are currently running. Which happens to include the thread 1. IPI is delivered and we have static void __crst_table_upgrade(void *arg) { struct mm_struct *mm = arg; if (current->active_mm == mm) set_user_asce(mm); __tlb_flush_local(); } run on CPU1. That does static inline void set_user_asce(struct mm_struct *mm) { S390_lowcore.user_asce = mm->context.asce; OK, user page table address updated... __ctl_load(S390_lowcore.user_asce, 1, 1); ... and control register 1 set to it. clear_cpu_flag(CIF_ASCE_PRIMARY); } IPI is run in home space mode, so it's fine - insns are fetched using c13, which always points to kernel page table. But as soon as we return from the interrupt, previous PSW is restored, putting CPU1 back into secondary space mode, at which point we no longer get the kernel instructions from the kernel mapping. The fix is to only fixup the control registers that are currently in use for user processes during the page table update. We must also disable interrupts in enable_sacf_uaccess to synchronize the cr and thread.mm_segment updates against the on_each-cpu. Fixes: 0aaba41b58bc ("s390: remove all code using the access register mode") Cc: stable@vger.kernel.org # 4.15+ Reported-by: Al Viro <viro@zeniv.linux.org.uk> Reviewed-by: Gerald Schaefer <gerald.schaefer@de.ibm.com> References: CVE-2020-11884 Signed-off-by: Christian Borntraeger <borntraeger@de.ibm.com>
2020-04-15 13:21:01 +00:00
}
__tlb_flush_local();
}
int crst_table_upgrade(struct mm_struct *mm, unsigned long end)
{
unsigned long *pgd = NULL, *p4d = NULL, *__pgd;
unsigned long asce_limit = mm->context.asce_limit;
/* upgrade should only happen from 3 to 4, 3 to 5, or 4 to 5 levels */
VM_BUG_ON(asce_limit < _REGION2_SIZE);
if (end <= asce_limit)
return 0;
if (asce_limit == _REGION2_SIZE) {
p4d = crst_table_alloc(mm);
if (unlikely(!p4d))
goto err_p4d;
crst_table_init(p4d, _REGION2_ENTRY_EMPTY);
}
if (end > _REGION1_SIZE) {
pgd = crst_table_alloc(mm);
if (unlikely(!pgd))
goto err_pgd;
crst_table_init(pgd, _REGION1_ENTRY_EMPTY);
}
spin_lock_bh(&mm->page_table_lock);
/*
* This routine gets called with mmap_lock lock held and there is
* no reason to optimize for the case of otherwise. However, if
* that would ever change, the below check will let us know.
*/
VM_BUG_ON(asce_limit != mm->context.asce_limit);
if (p4d) {
__pgd = (unsigned long *) mm->pgd;
p4d_populate(mm, (p4d_t *) p4d, (pud_t *) __pgd);
mm->pgd = (pgd_t *) p4d;
mm->context.asce_limit = _REGION1_SIZE;
mm->context.asce = __pa(mm->pgd) | _ASCE_TABLE_LENGTH |
_ASCE_USER_BITS | _ASCE_TYPE_REGION2;
mm_inc_nr_puds(mm);
}
if (pgd) {
__pgd = (unsigned long *) mm->pgd;
pgd_populate(mm, (pgd_t *) pgd, (p4d_t *) __pgd);
mm->pgd = (pgd_t *) pgd;
mm->context.asce_limit = TASK_SIZE_MAX;
mm->context.asce = __pa(mm->pgd) | _ASCE_TABLE_LENGTH |
_ASCE_USER_BITS | _ASCE_TYPE_REGION1;
}
spin_unlock_bh(&mm->page_table_lock);
on_each_cpu(__crst_table_upgrade, mm, 0);
return 0;
err_pgd:
crst_table_free(mm, p4d);
err_p4d:
return -ENOMEM;
}
static inline unsigned int atomic_xor_bits(atomic_t *v, unsigned int bits)
{
unsigned int old, new;
do {
old = atomic_read(v);
new = old ^ bits;
} while (atomic_cmpxchg(v, old, new) != old);
return new;
}
s390/mm: add shadow gmap support For a nested KVM guest the outer KVM host needs to create shadow page tables for the nested guest. This patch adds the basic support to the guest address space (gmap) code. For each guest address space the inner KVM host creates, the first outer KVM host needs to create shadow page tables. The address space is identified by the ASCE loaded into the control register 1 at the time the inner SIE instruction for the second nested KVM guest is executed. The outer KVM host creates the shadow tables starting with the table identified by the ASCE on a on-demand basis. The outer KVM host will get repeated faults for all the shadow tables needed to run the second KVM guest. While a shadow page table for the second KVM guest is active the access to the origin region, segment and page tables needs to be restricted for the first KVM guest. For region and segment and page tables the first KVM guest may read the memory, but write attempt has to lead to an unshadow. This is done using the page invalid and read-only bits in the page table of the first KVM guest. If the first guest re-accesses one of the origin pages of a shadow, it gets a fault and the affected parts of the shadow page table hierarchy needs to be removed again. PGSTE tables don't have to be shadowed, as all interpretation assist can't deal with the invalid bits in the shadow pte being set differently than the original ones provided by the first KVM guest. Many bug fixes and improvements by David Hildenbrand. Reviewed-by: David Hildenbrand <dahi@linux.vnet.ibm.com> Signed-off-by: Martin Schwidefsky <schwidefsky@de.ibm.com> Signed-off-by: Christian Borntraeger <borntraeger@de.ibm.com>
2016-03-08 11:12:18 +00:00
#ifdef CONFIG_PGSTE
struct page *page_table_alloc_pgste(struct mm_struct *mm)
{
struct page *page;
u64 *table;
s390/mm: add shadow gmap support For a nested KVM guest the outer KVM host needs to create shadow page tables for the nested guest. This patch adds the basic support to the guest address space (gmap) code. For each guest address space the inner KVM host creates, the first outer KVM host needs to create shadow page tables. The address space is identified by the ASCE loaded into the control register 1 at the time the inner SIE instruction for the second nested KVM guest is executed. The outer KVM host creates the shadow tables starting with the table identified by the ASCE on a on-demand basis. The outer KVM host will get repeated faults for all the shadow tables needed to run the second KVM guest. While a shadow page table for the second KVM guest is active the access to the origin region, segment and page tables needs to be restricted for the first KVM guest. For region and segment and page tables the first KVM guest may read the memory, but write attempt has to lead to an unshadow. This is done using the page invalid and read-only bits in the page table of the first KVM guest. If the first guest re-accesses one of the origin pages of a shadow, it gets a fault and the affected parts of the shadow page table hierarchy needs to be removed again. PGSTE tables don't have to be shadowed, as all interpretation assist can't deal with the invalid bits in the shadow pte being set differently than the original ones provided by the first KVM guest. Many bug fixes and improvements by David Hildenbrand. Reviewed-by: David Hildenbrand <dahi@linux.vnet.ibm.com> Signed-off-by: Martin Schwidefsky <schwidefsky@de.ibm.com> Signed-off-by: Christian Borntraeger <borntraeger@de.ibm.com>
2016-03-08 11:12:18 +00:00
page = alloc_page(GFP_KERNEL);
s390/mm: add shadow gmap support For a nested KVM guest the outer KVM host needs to create shadow page tables for the nested guest. This patch adds the basic support to the guest address space (gmap) code. For each guest address space the inner KVM host creates, the first outer KVM host needs to create shadow page tables. The address space is identified by the ASCE loaded into the control register 1 at the time the inner SIE instruction for the second nested KVM guest is executed. The outer KVM host creates the shadow tables starting with the table identified by the ASCE on a on-demand basis. The outer KVM host will get repeated faults for all the shadow tables needed to run the second KVM guest. While a shadow page table for the second KVM guest is active the access to the origin region, segment and page tables needs to be restricted for the first KVM guest. For region and segment and page tables the first KVM guest may read the memory, but write attempt has to lead to an unshadow. This is done using the page invalid and read-only bits in the page table of the first KVM guest. If the first guest re-accesses one of the origin pages of a shadow, it gets a fault and the affected parts of the shadow page table hierarchy needs to be removed again. PGSTE tables don't have to be shadowed, as all interpretation assist can't deal with the invalid bits in the shadow pte being set differently than the original ones provided by the first KVM guest. Many bug fixes and improvements by David Hildenbrand. Reviewed-by: David Hildenbrand <dahi@linux.vnet.ibm.com> Signed-off-by: Martin Schwidefsky <schwidefsky@de.ibm.com> Signed-off-by: Christian Borntraeger <borntraeger@de.ibm.com>
2016-03-08 11:12:18 +00:00
if (page) {
table = (u64 *)page_to_virt(page);
memset64(table, _PAGE_INVALID, PTRS_PER_PTE);
memset64(table + PTRS_PER_PTE, 0, PTRS_PER_PTE);
s390/mm: add shadow gmap support For a nested KVM guest the outer KVM host needs to create shadow page tables for the nested guest. This patch adds the basic support to the guest address space (gmap) code. For each guest address space the inner KVM host creates, the first outer KVM host needs to create shadow page tables. The address space is identified by the ASCE loaded into the control register 1 at the time the inner SIE instruction for the second nested KVM guest is executed. The outer KVM host creates the shadow tables starting with the table identified by the ASCE on a on-demand basis. The outer KVM host will get repeated faults for all the shadow tables needed to run the second KVM guest. While a shadow page table for the second KVM guest is active the access to the origin region, segment and page tables needs to be restricted for the first KVM guest. For region and segment and page tables the first KVM guest may read the memory, but write attempt has to lead to an unshadow. This is done using the page invalid and read-only bits in the page table of the first KVM guest. If the first guest re-accesses one of the origin pages of a shadow, it gets a fault and the affected parts of the shadow page table hierarchy needs to be removed again. PGSTE tables don't have to be shadowed, as all interpretation assist can't deal with the invalid bits in the shadow pte being set differently than the original ones provided by the first KVM guest. Many bug fixes and improvements by David Hildenbrand. Reviewed-by: David Hildenbrand <dahi@linux.vnet.ibm.com> Signed-off-by: Martin Schwidefsky <schwidefsky@de.ibm.com> Signed-off-by: Christian Borntraeger <borntraeger@de.ibm.com>
2016-03-08 11:12:18 +00:00
}
return page;
}
void page_table_free_pgste(struct page *page)
{
__free_page(page);
}
#endif /* CONFIG_PGSTE */
/*
* page table entry allocation/free routines.
*/
unsigned long *page_table_alloc(struct mm_struct *mm)
{
unsigned long *table;
struct page *page;
unsigned int mask, bit;
/* Try to get a fragment of a 4K page as a 2K page table */
if (!mm_alloc_pgste(mm)) {
table = NULL;
spin_lock_bh(&mm->context.lock);
if (!list_empty(&mm->context.pgtable_list)) {
page = list_first_entry(&mm->context.pgtable_list,
struct page, lru);
s390: use _refcount for pgtables Patch series "Rearrange struct page", v6. As presented at LSFMM, this patch-set rearranges struct page to give more contiguous usable space to users who have allocated a struct page for their own purposes. For a graphical view of before-and-after, see the first two tabs of https://docs.google.com/spreadsheets/d/1tvCszs_7FXrjei9_mtFiKV6nW1FLnYyvPvW-qNZhdog/edit?usp=sharing Highlights: - deferred_list now really exists in struct page instead of just a comment. - hmm_data also exists in struct page instead of being a nasty hack. - x86's PGD pages have a real pointer to the mm_struct. - VMalloc pages now have all sorts of extra information stored in them to help with debugging and tuning. - rcu_head is no longer tied to slab in case anyone else wants to free pages by RCU. - slub's counters no longer share space with _refcount. - slub's freelist+counters are now naturally dword aligned. - slub loses a parameter to a lot of functions and a sysfs file. This patch (of 17): s390 borrows the storage used for _mapcount in struct page in order to account whether the bottom or top half is being used for 2kB page tables. I want to use that for something else, so use the top byte of _refcount instead of the bottom byte of _mapcount. _refcount may temporarily be incremented by other CPUs that see a stale pointer to this page in the page cache, but each CPU can only increment it by one, and there are no systems with 2^24 CPUs today, so they will not change the upper byte of _refcount. We do have to be a little careful not to lose any of their writes (as they will subsequently decrement the counter). Link: http://lkml.kernel.org/r/20180518194519.3820-2-willy@infradead.org Signed-off-by: Matthew Wilcox <mawilcox@microsoft.com> Acked-by: Martin Schwidefsky <schwidefsky@de.ibm.com> Cc: "Kirill A . Shutemov" <kirill.shutemov@linux.intel.com> Cc: Christoph Lameter <cl@linux.com> Cc: Lai Jiangshan <jiangshanlai@gmail.com> Cc: Pekka Enberg <penberg@kernel.org> Cc: Vlastimil Babka <vbabka@suse.cz> Cc: Dave Hansen <dave.hansen@linux.intel.com> Cc: Jérôme Glisse <jglisse@redhat.com> Cc: Randy Dunlap <rdunlap@infradead.org> Cc: Andrey Ryabinin <aryabinin@virtuozzo.com> Signed-off-by: Andrew Morton <akpm@linux-foundation.org> Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2018-06-08 00:08:15 +00:00
mask = atomic_read(&page->_refcount) >> 24;
mask = (mask | (mask >> 4)) & 3;
if (mask != 3) {
table = (unsigned long *) page_to_virt(page);
bit = mask & 1; /* =1 -> second 2K */
if (bit)
table += PTRS_PER_PTE;
s390: use _refcount for pgtables Patch series "Rearrange struct page", v6. As presented at LSFMM, this patch-set rearranges struct page to give more contiguous usable space to users who have allocated a struct page for their own purposes. For a graphical view of before-and-after, see the first two tabs of https://docs.google.com/spreadsheets/d/1tvCszs_7FXrjei9_mtFiKV6nW1FLnYyvPvW-qNZhdog/edit?usp=sharing Highlights: - deferred_list now really exists in struct page instead of just a comment. - hmm_data also exists in struct page instead of being a nasty hack. - x86's PGD pages have a real pointer to the mm_struct. - VMalloc pages now have all sorts of extra information stored in them to help with debugging and tuning. - rcu_head is no longer tied to slab in case anyone else wants to free pages by RCU. - slub's counters no longer share space with _refcount. - slub's freelist+counters are now naturally dword aligned. - slub loses a parameter to a lot of functions and a sysfs file. This patch (of 17): s390 borrows the storage used for _mapcount in struct page in order to account whether the bottom or top half is being used for 2kB page tables. I want to use that for something else, so use the top byte of _refcount instead of the bottom byte of _mapcount. _refcount may temporarily be incremented by other CPUs that see a stale pointer to this page in the page cache, but each CPU can only increment it by one, and there are no systems with 2^24 CPUs today, so they will not change the upper byte of _refcount. We do have to be a little careful not to lose any of their writes (as they will subsequently decrement the counter). Link: http://lkml.kernel.org/r/20180518194519.3820-2-willy@infradead.org Signed-off-by: Matthew Wilcox <mawilcox@microsoft.com> Acked-by: Martin Schwidefsky <schwidefsky@de.ibm.com> Cc: "Kirill A . Shutemov" <kirill.shutemov@linux.intel.com> Cc: Christoph Lameter <cl@linux.com> Cc: Lai Jiangshan <jiangshanlai@gmail.com> Cc: Pekka Enberg <penberg@kernel.org> Cc: Vlastimil Babka <vbabka@suse.cz> Cc: Dave Hansen <dave.hansen@linux.intel.com> Cc: Jérôme Glisse <jglisse@redhat.com> Cc: Randy Dunlap <rdunlap@infradead.org> Cc: Andrey Ryabinin <aryabinin@virtuozzo.com> Signed-off-by: Andrew Morton <akpm@linux-foundation.org> Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2018-06-08 00:08:15 +00:00
atomic_xor_bits(&page->_refcount,
1U << (bit + 24));
list_del(&page->lru);
}
}
spin_unlock_bh(&mm->context.lock);
if (table)
return table;
}
/* Allocate a fresh page */
page = alloc_page(GFP_KERNEL);
if (!page)
return NULL;
if (!pgtable_pte_page_ctor(page)) {
__free_page(page);
return NULL;
}
arch_set_page_dat(page, 0);
/* Initialize page table */
table = (unsigned long *) page_to_virt(page);
if (mm_alloc_pgste(mm)) {
/* Return 4K page table with PGSTEs */
s390: use _refcount for pgtables Patch series "Rearrange struct page", v6. As presented at LSFMM, this patch-set rearranges struct page to give more contiguous usable space to users who have allocated a struct page for their own purposes. For a graphical view of before-and-after, see the first two tabs of https://docs.google.com/spreadsheets/d/1tvCszs_7FXrjei9_mtFiKV6nW1FLnYyvPvW-qNZhdog/edit?usp=sharing Highlights: - deferred_list now really exists in struct page instead of just a comment. - hmm_data also exists in struct page instead of being a nasty hack. - x86's PGD pages have a real pointer to the mm_struct. - VMalloc pages now have all sorts of extra information stored in them to help with debugging and tuning. - rcu_head is no longer tied to slab in case anyone else wants to free pages by RCU. - slub's counters no longer share space with _refcount. - slub's freelist+counters are now naturally dword aligned. - slub loses a parameter to a lot of functions and a sysfs file. This patch (of 17): s390 borrows the storage used for _mapcount in struct page in order to account whether the bottom or top half is being used for 2kB page tables. I want to use that for something else, so use the top byte of _refcount instead of the bottom byte of _mapcount. _refcount may temporarily be incremented by other CPUs that see a stale pointer to this page in the page cache, but each CPU can only increment it by one, and there are no systems with 2^24 CPUs today, so they will not change the upper byte of _refcount. We do have to be a little careful not to lose any of their writes (as they will subsequently decrement the counter). Link: http://lkml.kernel.org/r/20180518194519.3820-2-willy@infradead.org Signed-off-by: Matthew Wilcox <mawilcox@microsoft.com> Acked-by: Martin Schwidefsky <schwidefsky@de.ibm.com> Cc: "Kirill A . Shutemov" <kirill.shutemov@linux.intel.com> Cc: Christoph Lameter <cl@linux.com> Cc: Lai Jiangshan <jiangshanlai@gmail.com> Cc: Pekka Enberg <penberg@kernel.org> Cc: Vlastimil Babka <vbabka@suse.cz> Cc: Dave Hansen <dave.hansen@linux.intel.com> Cc: Jérôme Glisse <jglisse@redhat.com> Cc: Randy Dunlap <rdunlap@infradead.org> Cc: Andrey Ryabinin <aryabinin@virtuozzo.com> Signed-off-by: Andrew Morton <akpm@linux-foundation.org> Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2018-06-08 00:08:15 +00:00
atomic_xor_bits(&page->_refcount, 3 << 24);
memset64((u64 *)table, _PAGE_INVALID, PTRS_PER_PTE);
memset64((u64 *)table + PTRS_PER_PTE, 0, PTRS_PER_PTE);
} else {
/* Return the first 2K fragment of the page */
s390: use _refcount for pgtables Patch series "Rearrange struct page", v6. As presented at LSFMM, this patch-set rearranges struct page to give more contiguous usable space to users who have allocated a struct page for their own purposes. For a graphical view of before-and-after, see the first two tabs of https://docs.google.com/spreadsheets/d/1tvCszs_7FXrjei9_mtFiKV6nW1FLnYyvPvW-qNZhdog/edit?usp=sharing Highlights: - deferred_list now really exists in struct page instead of just a comment. - hmm_data also exists in struct page instead of being a nasty hack. - x86's PGD pages have a real pointer to the mm_struct. - VMalloc pages now have all sorts of extra information stored in them to help with debugging and tuning. - rcu_head is no longer tied to slab in case anyone else wants to free pages by RCU. - slub's counters no longer share space with _refcount. - slub's freelist+counters are now naturally dword aligned. - slub loses a parameter to a lot of functions and a sysfs file. This patch (of 17): s390 borrows the storage used for _mapcount in struct page in order to account whether the bottom or top half is being used for 2kB page tables. I want to use that for something else, so use the top byte of _refcount instead of the bottom byte of _mapcount. _refcount may temporarily be incremented by other CPUs that see a stale pointer to this page in the page cache, but each CPU can only increment it by one, and there are no systems with 2^24 CPUs today, so they will not change the upper byte of _refcount. We do have to be a little careful not to lose any of their writes (as they will subsequently decrement the counter). Link: http://lkml.kernel.org/r/20180518194519.3820-2-willy@infradead.org Signed-off-by: Matthew Wilcox <mawilcox@microsoft.com> Acked-by: Martin Schwidefsky <schwidefsky@de.ibm.com> Cc: "Kirill A . Shutemov" <kirill.shutemov@linux.intel.com> Cc: Christoph Lameter <cl@linux.com> Cc: Lai Jiangshan <jiangshanlai@gmail.com> Cc: Pekka Enberg <penberg@kernel.org> Cc: Vlastimil Babka <vbabka@suse.cz> Cc: Dave Hansen <dave.hansen@linux.intel.com> Cc: Jérôme Glisse <jglisse@redhat.com> Cc: Randy Dunlap <rdunlap@infradead.org> Cc: Andrey Ryabinin <aryabinin@virtuozzo.com> Signed-off-by: Andrew Morton <akpm@linux-foundation.org> Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2018-06-08 00:08:15 +00:00
atomic_xor_bits(&page->_refcount, 1 << 24);
memset64((u64 *)table, _PAGE_INVALID, 2 * PTRS_PER_PTE);
spin_lock_bh(&mm->context.lock);
list_add(&page->lru, &mm->context.pgtable_list);
spin_unlock_bh(&mm->context.lock);
}
return table;
}
void page_table_free(struct mm_struct *mm, unsigned long *table)
{
struct page *page;
unsigned int bit, mask;
page = virt_to_page(table);
if (!mm_alloc_pgste(mm)) {
/* Free 2K page table fragment of a 4K page */
bit = ((unsigned long) table & ~PAGE_MASK)/(PTRS_PER_PTE*sizeof(pte_t));
spin_lock_bh(&mm->context.lock);
s390: use _refcount for pgtables Patch series "Rearrange struct page", v6. As presented at LSFMM, this patch-set rearranges struct page to give more contiguous usable space to users who have allocated a struct page for their own purposes. For a graphical view of before-and-after, see the first two tabs of https://docs.google.com/spreadsheets/d/1tvCszs_7FXrjei9_mtFiKV6nW1FLnYyvPvW-qNZhdog/edit?usp=sharing Highlights: - deferred_list now really exists in struct page instead of just a comment. - hmm_data also exists in struct page instead of being a nasty hack. - x86's PGD pages have a real pointer to the mm_struct. - VMalloc pages now have all sorts of extra information stored in them to help with debugging and tuning. - rcu_head is no longer tied to slab in case anyone else wants to free pages by RCU. - slub's counters no longer share space with _refcount. - slub's freelist+counters are now naturally dword aligned. - slub loses a parameter to a lot of functions and a sysfs file. This patch (of 17): s390 borrows the storage used for _mapcount in struct page in order to account whether the bottom or top half is being used for 2kB page tables. I want to use that for something else, so use the top byte of _refcount instead of the bottom byte of _mapcount. _refcount may temporarily be incremented by other CPUs that see a stale pointer to this page in the page cache, but each CPU can only increment it by one, and there are no systems with 2^24 CPUs today, so they will not change the upper byte of _refcount. We do have to be a little careful not to lose any of their writes (as they will subsequently decrement the counter). Link: http://lkml.kernel.org/r/20180518194519.3820-2-willy@infradead.org Signed-off-by: Matthew Wilcox <mawilcox@microsoft.com> Acked-by: Martin Schwidefsky <schwidefsky@de.ibm.com> Cc: "Kirill A . Shutemov" <kirill.shutemov@linux.intel.com> Cc: Christoph Lameter <cl@linux.com> Cc: Lai Jiangshan <jiangshanlai@gmail.com> Cc: Pekka Enberg <penberg@kernel.org> Cc: Vlastimil Babka <vbabka@suse.cz> Cc: Dave Hansen <dave.hansen@linux.intel.com> Cc: Jérôme Glisse <jglisse@redhat.com> Cc: Randy Dunlap <rdunlap@infradead.org> Cc: Andrey Ryabinin <aryabinin@virtuozzo.com> Signed-off-by: Andrew Morton <akpm@linux-foundation.org> Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2018-06-08 00:08:15 +00:00
mask = atomic_xor_bits(&page->_refcount, 1U << (bit + 24));
mask >>= 24;
if (mask & 3)
list_add(&page->lru, &mm->context.pgtable_list);
else
list_del(&page->lru);
spin_unlock_bh(&mm->context.lock);
if (mask != 0)
return;
} else {
atomic_xor_bits(&page->_refcount, 3U << 24);
}
pgtable_pte_page_dtor(page);
__free_page(page);
}
void page_table_free_rcu(struct mmu_gather *tlb, unsigned long *table,
unsigned long vmaddr)
{
struct mm_struct *mm;
struct page *page;
unsigned int bit, mask;
mm = tlb->mm;
page = virt_to_page(table);
if (mm_alloc_pgste(mm)) {
gmap_unlink(mm, table, vmaddr);
table = (unsigned long *) ((unsigned long)table | 3);
tlb_remove_table(tlb, table);
return;
}
bit = ((unsigned long) table & ~PAGE_MASK) / (PTRS_PER_PTE*sizeof(pte_t));
spin_lock_bh(&mm->context.lock);
s390: use _refcount for pgtables Patch series "Rearrange struct page", v6. As presented at LSFMM, this patch-set rearranges struct page to give more contiguous usable space to users who have allocated a struct page for their own purposes. For a graphical view of before-and-after, see the first two tabs of https://docs.google.com/spreadsheets/d/1tvCszs_7FXrjei9_mtFiKV6nW1FLnYyvPvW-qNZhdog/edit?usp=sharing Highlights: - deferred_list now really exists in struct page instead of just a comment. - hmm_data also exists in struct page instead of being a nasty hack. - x86's PGD pages have a real pointer to the mm_struct. - VMalloc pages now have all sorts of extra information stored in them to help with debugging and tuning. - rcu_head is no longer tied to slab in case anyone else wants to free pages by RCU. - slub's counters no longer share space with _refcount. - slub's freelist+counters are now naturally dword aligned. - slub loses a parameter to a lot of functions and a sysfs file. This patch (of 17): s390 borrows the storage used for _mapcount in struct page in order to account whether the bottom or top half is being used for 2kB page tables. I want to use that for something else, so use the top byte of _refcount instead of the bottom byte of _mapcount. _refcount may temporarily be incremented by other CPUs that see a stale pointer to this page in the page cache, but each CPU can only increment it by one, and there are no systems with 2^24 CPUs today, so they will not change the upper byte of _refcount. We do have to be a little careful not to lose any of their writes (as they will subsequently decrement the counter). Link: http://lkml.kernel.org/r/20180518194519.3820-2-willy@infradead.org Signed-off-by: Matthew Wilcox <mawilcox@microsoft.com> Acked-by: Martin Schwidefsky <schwidefsky@de.ibm.com> Cc: "Kirill A . Shutemov" <kirill.shutemov@linux.intel.com> Cc: Christoph Lameter <cl@linux.com> Cc: Lai Jiangshan <jiangshanlai@gmail.com> Cc: Pekka Enberg <penberg@kernel.org> Cc: Vlastimil Babka <vbabka@suse.cz> Cc: Dave Hansen <dave.hansen@linux.intel.com> Cc: Jérôme Glisse <jglisse@redhat.com> Cc: Randy Dunlap <rdunlap@infradead.org> Cc: Andrey Ryabinin <aryabinin@virtuozzo.com> Signed-off-by: Andrew Morton <akpm@linux-foundation.org> Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2018-06-08 00:08:15 +00:00
mask = atomic_xor_bits(&page->_refcount, 0x11U << (bit + 24));
mask >>= 24;
if (mask & 3)
list_add_tail(&page->lru, &mm->context.pgtable_list);
else
list_del(&page->lru);
spin_unlock_bh(&mm->context.lock);
table = (unsigned long *) ((unsigned long) table | (1U << bit));
tlb_remove_table(tlb, table);
}
void __tlb_remove_table(void *_table)
{
unsigned int mask = (unsigned long) _table & 3;
void *table = (void *)((unsigned long) _table ^ mask);
struct page *page = virt_to_page(table);
switch (mask) {
case 0: /* pmd, pud, or p4d */
free_pages((unsigned long) table, 2);
break;
case 1: /* lower 2K of a 4K page table */
case 2: /* higher 2K of a 4K page table */
s390: use _refcount for pgtables Patch series "Rearrange struct page", v6. As presented at LSFMM, this patch-set rearranges struct page to give more contiguous usable space to users who have allocated a struct page for their own purposes. For a graphical view of before-and-after, see the first two tabs of https://docs.google.com/spreadsheets/d/1tvCszs_7FXrjei9_mtFiKV6nW1FLnYyvPvW-qNZhdog/edit?usp=sharing Highlights: - deferred_list now really exists in struct page instead of just a comment. - hmm_data also exists in struct page instead of being a nasty hack. - x86's PGD pages have a real pointer to the mm_struct. - VMalloc pages now have all sorts of extra information stored in them to help with debugging and tuning. - rcu_head is no longer tied to slab in case anyone else wants to free pages by RCU. - slub's counters no longer share space with _refcount. - slub's freelist+counters are now naturally dword aligned. - slub loses a parameter to a lot of functions and a sysfs file. This patch (of 17): s390 borrows the storage used for _mapcount in struct page in order to account whether the bottom or top half is being used for 2kB page tables. I want to use that for something else, so use the top byte of _refcount instead of the bottom byte of _mapcount. _refcount may temporarily be incremented by other CPUs that see a stale pointer to this page in the page cache, but each CPU can only increment it by one, and there are no systems with 2^24 CPUs today, so they will not change the upper byte of _refcount. We do have to be a little careful not to lose any of their writes (as they will subsequently decrement the counter). Link: http://lkml.kernel.org/r/20180518194519.3820-2-willy@infradead.org Signed-off-by: Matthew Wilcox <mawilcox@microsoft.com> Acked-by: Martin Schwidefsky <schwidefsky@de.ibm.com> Cc: "Kirill A . Shutemov" <kirill.shutemov@linux.intel.com> Cc: Christoph Lameter <cl@linux.com> Cc: Lai Jiangshan <jiangshanlai@gmail.com> Cc: Pekka Enberg <penberg@kernel.org> Cc: Vlastimil Babka <vbabka@suse.cz> Cc: Dave Hansen <dave.hansen@linux.intel.com> Cc: Jérôme Glisse <jglisse@redhat.com> Cc: Randy Dunlap <rdunlap@infradead.org> Cc: Andrey Ryabinin <aryabinin@virtuozzo.com> Signed-off-by: Andrew Morton <akpm@linux-foundation.org> Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2018-06-08 00:08:15 +00:00
mask = atomic_xor_bits(&page->_refcount, mask << (4 + 24));
mask >>= 24;
if (mask != 0)
break;
fallthrough;
case 3: /* 4K page table with pgstes */
if (mask & 3)
atomic_xor_bits(&page->_refcount, 3 << 24);
pgtable_pte_page_dtor(page);
__free_page(page);
break;
}
}
/*
* Base infrastructure required to generate basic asces, region, segment,
* and page tables that do not make use of enhanced features like EDAT1.
*/
static struct kmem_cache *base_pgt_cache;
static unsigned long base_pgt_alloc(void)
{
u64 *table;
table = kmem_cache_alloc(base_pgt_cache, GFP_KERNEL);
if (table)
memset64(table, _PAGE_INVALID, PTRS_PER_PTE);
return (unsigned long) table;
}
static void base_pgt_free(unsigned long table)
{
kmem_cache_free(base_pgt_cache, (void *) table);
}
static unsigned long base_crst_alloc(unsigned long val)
{
unsigned long table;
table = __get_free_pages(GFP_KERNEL, CRST_ALLOC_ORDER);
if (table)
crst_table_init((unsigned long *)table, val);
return table;
}
static void base_crst_free(unsigned long table)
{
free_pages(table, CRST_ALLOC_ORDER);
}
#define BASE_ADDR_END_FUNC(NAME, SIZE) \
static inline unsigned long base_##NAME##_addr_end(unsigned long addr, \
unsigned long end) \
{ \
unsigned long next = (addr + (SIZE)) & ~((SIZE) - 1); \
\
return (next - 1) < (end - 1) ? next : end; \
}
BASE_ADDR_END_FUNC(page, _PAGE_SIZE)
BASE_ADDR_END_FUNC(segment, _SEGMENT_SIZE)
BASE_ADDR_END_FUNC(region3, _REGION3_SIZE)
BASE_ADDR_END_FUNC(region2, _REGION2_SIZE)
BASE_ADDR_END_FUNC(region1, _REGION1_SIZE)
static inline unsigned long base_lra(unsigned long address)
{
unsigned long real;
asm volatile(
" lra %0,0(%1)\n"
: "=d" (real) : "a" (address) : "cc");
return real;
}
static int base_page_walk(unsigned long origin, unsigned long addr,
unsigned long end, int alloc)
{
unsigned long *pte, next;
if (!alloc)
return 0;
pte = (unsigned long *) origin;
pte += (addr & _PAGE_INDEX) >> _PAGE_SHIFT;
do {
next = base_page_addr_end(addr, end);
*pte = base_lra(addr);
} while (pte++, addr = next, addr < end);
return 0;
}
static int base_segment_walk(unsigned long origin, unsigned long addr,
unsigned long end, int alloc)
{
unsigned long *ste, next, table;
int rc;
ste = (unsigned long *) origin;
ste += (addr & _SEGMENT_INDEX) >> _SEGMENT_SHIFT;
do {
next = base_segment_addr_end(addr, end);
if (*ste & _SEGMENT_ENTRY_INVALID) {
if (!alloc)
continue;
table = base_pgt_alloc();
if (!table)
return -ENOMEM;
*ste = table | _SEGMENT_ENTRY;
}
table = *ste & _SEGMENT_ENTRY_ORIGIN;
rc = base_page_walk(table, addr, next, alloc);
if (rc)
return rc;
if (!alloc)
base_pgt_free(table);
cond_resched();
} while (ste++, addr = next, addr < end);
return 0;
}
static int base_region3_walk(unsigned long origin, unsigned long addr,
unsigned long end, int alloc)
{
unsigned long *rtte, next, table;
int rc;
rtte = (unsigned long *) origin;
rtte += (addr & _REGION3_INDEX) >> _REGION3_SHIFT;
do {
next = base_region3_addr_end(addr, end);
if (*rtte & _REGION_ENTRY_INVALID) {
if (!alloc)
continue;
table = base_crst_alloc(_SEGMENT_ENTRY_EMPTY);
if (!table)
return -ENOMEM;
*rtte = table | _REGION3_ENTRY;
}
table = *rtte & _REGION_ENTRY_ORIGIN;
rc = base_segment_walk(table, addr, next, alloc);
if (rc)
return rc;
if (!alloc)
base_crst_free(table);
} while (rtte++, addr = next, addr < end);
return 0;
}
static int base_region2_walk(unsigned long origin, unsigned long addr,
unsigned long end, int alloc)
{
unsigned long *rste, next, table;
int rc;
rste = (unsigned long *) origin;
rste += (addr & _REGION2_INDEX) >> _REGION2_SHIFT;
do {
next = base_region2_addr_end(addr, end);
if (*rste & _REGION_ENTRY_INVALID) {
if (!alloc)
continue;
table = base_crst_alloc(_REGION3_ENTRY_EMPTY);
if (!table)
return -ENOMEM;
*rste = table | _REGION2_ENTRY;
}
table = *rste & _REGION_ENTRY_ORIGIN;
rc = base_region3_walk(table, addr, next, alloc);
if (rc)
return rc;
if (!alloc)
base_crst_free(table);
} while (rste++, addr = next, addr < end);
return 0;
}
static int base_region1_walk(unsigned long origin, unsigned long addr,
unsigned long end, int alloc)
{
unsigned long *rfte, next, table;
int rc;
rfte = (unsigned long *) origin;
rfte += (addr & _REGION1_INDEX) >> _REGION1_SHIFT;
do {
next = base_region1_addr_end(addr, end);
if (*rfte & _REGION_ENTRY_INVALID) {
if (!alloc)
continue;
table = base_crst_alloc(_REGION2_ENTRY_EMPTY);
if (!table)
return -ENOMEM;
*rfte = table | _REGION1_ENTRY;
}
table = *rfte & _REGION_ENTRY_ORIGIN;
rc = base_region2_walk(table, addr, next, alloc);
if (rc)
return rc;
if (!alloc)
base_crst_free(table);
} while (rfte++, addr = next, addr < end);
return 0;
}
/**
* base_asce_free - free asce and tables returned from base_asce_alloc()
* @asce: asce to be freed
*
* Frees all region, segment, and page tables that were allocated with a
* corresponding base_asce_alloc() call.
*/
void base_asce_free(unsigned long asce)
{
unsigned long table = asce & _ASCE_ORIGIN;
if (!asce)
return;
switch (asce & _ASCE_TYPE_MASK) {
case _ASCE_TYPE_SEGMENT:
base_segment_walk(table, 0, _REGION3_SIZE, 0);
break;
case _ASCE_TYPE_REGION3:
base_region3_walk(table, 0, _REGION2_SIZE, 0);
break;
case _ASCE_TYPE_REGION2:
base_region2_walk(table, 0, _REGION1_SIZE, 0);
break;
case _ASCE_TYPE_REGION1:
base_region1_walk(table, 0, TASK_SIZE_MAX, 0);
break;
}
base_crst_free(table);
}
static int base_pgt_cache_init(void)
{
static DEFINE_MUTEX(base_pgt_cache_mutex);
unsigned long sz = _PAGE_TABLE_SIZE;
if (base_pgt_cache)
return 0;
mutex_lock(&base_pgt_cache_mutex);
if (!base_pgt_cache)
base_pgt_cache = kmem_cache_create("base_pgt", sz, sz, 0, NULL);
mutex_unlock(&base_pgt_cache_mutex);
return base_pgt_cache ? 0 : -ENOMEM;
}
/**
* base_asce_alloc - create kernel mapping without enhanced DAT features
* @addr: virtual start address of kernel mapping
* @num_pages: number of consecutive pages
*
* Generate an asce, including all required region, segment and page tables,
* that can be used to access the virtual kernel mapping. The difference is
* that the returned asce does not make use of any enhanced DAT features like
* e.g. large pages. This is required for some I/O functions that pass an
* asce, like e.g. some service call requests.
*
* Note: the returned asce may NEVER be attached to any cpu. It may only be
* used for I/O requests. tlb entries that might result because the
* asce was attached to a cpu won't be cleared.
*/
unsigned long base_asce_alloc(unsigned long addr, unsigned long num_pages)
{
unsigned long asce, table, end;
int rc;
if (base_pgt_cache_init())
return 0;
end = addr + num_pages * PAGE_SIZE;
if (end <= _REGION3_SIZE) {
table = base_crst_alloc(_SEGMENT_ENTRY_EMPTY);
if (!table)
return 0;
rc = base_segment_walk(table, addr, end, 1);
asce = table | _ASCE_TYPE_SEGMENT | _ASCE_TABLE_LENGTH;
} else if (end <= _REGION2_SIZE) {
table = base_crst_alloc(_REGION3_ENTRY_EMPTY);
if (!table)
return 0;
rc = base_region3_walk(table, addr, end, 1);
asce = table | _ASCE_TYPE_REGION3 | _ASCE_TABLE_LENGTH;
} else if (end <= _REGION1_SIZE) {
table = base_crst_alloc(_REGION2_ENTRY_EMPTY);
if (!table)
return 0;
rc = base_region2_walk(table, addr, end, 1);
asce = table | _ASCE_TYPE_REGION2 | _ASCE_TABLE_LENGTH;
} else {
table = base_crst_alloc(_REGION1_ENTRY_EMPTY);
if (!table)
return 0;
rc = base_region1_walk(table, addr, end, 1);
asce = table | _ASCE_TYPE_REGION1 | _ASCE_TABLE_LENGTH;
}
if (rc) {
base_asce_free(asce);
asce = 0;
}
return asce;
}