2018-01-02 22:12:01 +07:00
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#include <asm/vmlinux.lds.h>
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2008-05-13 04:01:56 +07:00
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#include <asm/page.h>
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2005-04-17 05:20:36 +07:00
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OUTPUT_FORMAT(ELF_FORMAT)
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OUTPUT_ARCH(ELF_ARCH)
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ENTRY(_start)
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jiffies = jiffies_64;
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SECTIONS
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{
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PROVIDE (__executable_start = START);
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. = START + SIZEOF_HEADERS;
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.interp : { *(.interp) }
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__binary_start = .;
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. = ALIGN(4096); /* Init code and data */
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2006-10-31 13:07:13 +07:00
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_text = .;
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2009-09-24 21:36:20 +07:00
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INIT_TEXT_SECTION(PAGE_SIZE)
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2005-04-17 05:20:36 +07:00
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2008-05-13 04:01:56 +07:00
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. = ALIGN(PAGE_SIZE);
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2005-04-17 05:20:36 +07:00
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/* Read-only sections, merged into text segment: */
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.hash : { *(.hash) }
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[PATCH] vDSO hash-style fix
The latest toolchains can produce a new ELF section in DSOs and
dynamically-linked executables. The new section ".gnu.hash" replaces
".hash", and allows for more efficient runtime symbol lookups by the
dynamic linker. The new ld option --hash-style={sysv|gnu|both} controls
whether to produce the old ".hash", the new ".gnu.hash", or both. In some
new systems such as Fedora Core 6, gcc by default passes --hash-style=gnu
to the linker, so that a standard invocation of "gcc -shared" results in
producing a DSO with only ".gnu.hash". The new ".gnu.hash" sections need
to be dealt with the same way as ".hash" sections in all respects; only the
dynamic linker cares about their contents. To work with older dynamic
linkers (i.e. preexisting releases of glibc), a binary must have the old
".hash" section. The --hash-style=both option produces binaries that a new
dynamic linker can use more efficiently, but an old dynamic linker can
still handle.
The new section runs afoul of the custom linker scripts used to build vDSO
images for the kernel. On ia64, the failure mode for this is a boot-time
panic because the vDSO's PT_IA_64_UNWIND segment winds up ill-formed.
This patch addresses the problem in two ways.
First, it mentions ".gnu.hash" in all the linker scripts alongside ".hash".
This produces correct vDSO images with --hash-style=sysv (or old tools),
with --hash-style=gnu, or with --hash-style=both.
Second, it passes the --hash-style=sysv option when building the vDSO
images, so that ".gnu.hash" is not actually produced. This is the most
conservative choice for compatibility with any old userland. There is some
concern that some ancient glibc builds (though not any known old production
system) might choke on --hash-style=both binaries. The optimizations
provided by the new style of hash section do not really matter for a DSO
with a tiny number of symbols, as the vDSO has. If someone wants to use
=gnu or =both for their vDSO builds and worry less about that
compatibility, just change the option and the linker script changes will
make any choice work fine.
Signed-off-by: Roland McGrath <roland@redhat.com>
Cc: "Luck, Tony" <tony.luck@intel.com>
Cc: Kyle McMartin <kyle@mcmartin.ca>
Cc: Paul Mackerras <paulus@samba.org>
Cc: Benjamin Herrenschmidt <benh@kernel.crashing.org>
Cc: Jeff Dike <jdike@addtoit.com>
Cc: Andi Kleen <ak@muc.de>
Cc: Sam Ravnborg <sam@ravnborg.org>
Signed-off-by: Andrew Morton <akpm@osdl.org>
Signed-off-by: Linus Torvalds <torvalds@osdl.org>
2006-07-30 17:04:06 +07:00
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.gnu.hash : { *(.gnu.hash) }
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2005-04-17 05:20:36 +07:00
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.dynsym : { *(.dynsym) }
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.dynstr : { *(.dynstr) }
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.gnu.version : { *(.gnu.version) }
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.gnu.version_d : { *(.gnu.version_d) }
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.gnu.version_r : { *(.gnu.version_r) }
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.rel.init : { *(.rel.init) }
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.rela.init : { *(.rela.init) }
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.rel.text : { *(.rel.text .rel.text.* .rel.gnu.linkonce.t.*) }
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.rela.text : { *(.rela.text .rela.text.* .rela.gnu.linkonce.t.*) }
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.rel.fini : { *(.rel.fini) }
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.rela.fini : { *(.rela.fini) }
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.rel.rodata : { *(.rel.rodata .rel.rodata.* .rel.gnu.linkonce.r.*) }
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.rela.rodata : { *(.rela.rodata .rela.rodata.* .rela.gnu.linkonce.r.*) }
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.rel.data : { *(.rel.data .rel.data.* .rel.gnu.linkonce.d.*) }
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.rela.data : { *(.rela.data .rela.data.* .rela.gnu.linkonce.d.*) }
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.rel.tdata : { *(.rel.tdata .rel.tdata.* .rel.gnu.linkonce.td.*) }
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.rela.tdata : { *(.rela.tdata .rela.tdata.* .rela.gnu.linkonce.td.*) }
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.rel.tbss : { *(.rel.tbss .rel.tbss.* .rel.gnu.linkonce.tb.*) }
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.rela.tbss : { *(.rela.tbss .rela.tbss.* .rela.gnu.linkonce.tb.*) }
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.rel.ctors : { *(.rel.ctors) }
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.rela.ctors : { *(.rela.ctors) }
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.rel.dtors : { *(.rel.dtors) }
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.rela.dtors : { *(.rela.dtors) }
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.rel.got : { *(.rel.got) }
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.rela.got : { *(.rela.got) }
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.rel.bss : { *(.rel.bss .rel.bss.* .rel.gnu.linkonce.b.*) }
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.rela.bss : { *(.rela.bss .rela.bss.* .rela.gnu.linkonce.b.*) }
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2010-10-27 04:22:19 +07:00
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.rel.plt : {
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*(.rel.plt)
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PROVIDE_HIDDEN(__rel_iplt_start = .);
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*(.rel.iplt)
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PROVIDE_HIDDEN(__rel_iplt_end = .);
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}
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.rela.plt : {
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*(.rela.plt)
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PROVIDE_HIDDEN(__rela_iplt_start = .);
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*(.rela.iplt)
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PROVIDE_HIDDEN(__rela_iplt_end = .);
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}
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2005-04-17 05:20:36 +07:00
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.init : {
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KEEP (*(.init))
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} =0x90909090
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.plt : { *(.plt) }
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.text : {
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2013-07-04 05:03:40 +07:00
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_stext = .;
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2007-05-13 05:31:33 +07:00
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TEXT_TEXT
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2005-04-17 05:20:36 +07:00
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SCHED_TEXT
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2016-10-08 07:02:55 +07:00
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CPUIDLE_TEXT
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2005-04-17 05:20:36 +07:00
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LOCK_TEXT
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2019-08-23 20:06:06 +07:00
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IRQENTRY_TEXT
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SOFTIRQENTRY_TEXT
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2005-04-17 05:20:36 +07:00
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*(.fixup)
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*(.stub .text.* .gnu.linkonce.t.*)
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/* .gnu.warning sections are handled specially by elf32.em. */
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*(.gnu.warning)
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[PATCH] uml: skas0 - separate kernel address space on stock hosts
UML has had two modes of operation - an insecure, slow mode (tt mode) in
which the kernel is mapped into every process address space which requires
no host kernel modifications, and a secure, faster mode (skas mode) in
which the UML kernel is in a separate host address space, which requires a
patch to the host kernel.
This patch implements something very close to skas mode for hosts which
don't support skas - I'm calling this skas0. It provides the security of
the skas host patch, and some of the performance gains.
The two main things that are provided by the skas patch, /proc/mm and
PTRACE_FAULTINFO, are implemented in a way that require no host patch.
For the remote address space changing stuff (mmap, munmap, and mprotect),
we set aside two pages in the process above its stack, one of which
contains a little bit of code which can call mmap et al.
To update the address space, the system call information (system call
number and arguments) are written to the stub page above the code. The
%esp is set to the beginning of the data, the %eip is set the the start of
the stub, and it repeatedly pops the information into its registers and
makes the system call until it sees a system call number of zero. This is
to amortize the cost of the context switch across multiple address space
updates.
When the updates are done, it SIGSTOPs itself, and the kernel process
continues what it was doing.
For a PTRACE_FAULTINFO replacement, we set up a SIGSEGV handler in the
child, and let it handle segfaults rather than nullifying them. The
handler is in the same page as the mmap stub. The second page is used as
the stack. The handler reads cr2 and err from the sigcontext, sticks them
at the base of the stack in a faultinfo struct, and SIGSTOPs itself. The
kernel then reads the faultinfo and handles the fault.
A complication on x86_64 is that this involves resetting the registers to
the segfault values when the process is inside the kill system call. This
breaks on x86_64 because %rcx will contain %rip because you tell SYSRET
where to return to by putting the value in %rcx. So, this corrupts $rcx on
return from the segfault. To work around this, I added an
arch_finish_segv, which on x86 does nothing, but which on x86_64 ptraces
the child back through the sigreturn. This causes %rcx to be restored by
sigreturn and avoids the corruption. Ultimately, I think I will replace
this with the trick of having it send itself a blocked signal which will be
unblocked by the sigreturn. This will allow it to be stopped just after
the sigreturn, and PTRACE_SYSCALLed without all the back-and-forth of
PTRACE_SYSCALLing it through sigreturn.
This runs on a stock host, so theoretically (and hopefully), tt mode isn't
needed any more. We need to make sure that this is better in every way
than tt mode, though. I'm concerned about the speed of address space
updates and page fault handling, since they involve extra round-trips to
the child. We can amortize the round-trip cost for large address space
updates by writing all of the operations to the data page and having the
child execute them all at the same time. This will help fork and exec, but
not page faults, since they involve only one page.
I can't think of any way to help page faults, except to add something like
PTRACE_FAULTINFO to the host. There is PTRACE_SIGINFO, but UML doesn't use
siginfo for SIGSEGV (or anything else) because there isn't enough
information in the siginfo struct to handle page faults (the faulting
operation type is missing). Adding that would make PTRACE_SIGINFO a usable
equivalent to PTRACE_FAULTINFO.
As for the code itself:
- The system call stub is in arch/um/kernel/sys-$(SUBARCH)/stub.S. It is
put in its own section of the binary along with stub_segv_handler in
arch/um/kernel/skas/process.c. This is manipulated with run_syscall_stub
in arch/um/kernel/skas/mem_user.c. syscall_stub will execute any system
call at all, but it's only used for mmap, munmap, and mprotect.
- The x86_64 stub calls sigreturn by hand rather than allowing the normal
sigreturn to happen, because the normal sigreturn is a SA_RESTORER in
UML's address space provided by libc. Needless to say, this is not
available in the child's address space. Also, it does a couple of odd
pops before that which restore the stack to the state it was in at the
time the signal handler was called.
- There is a new field in the arch mmu_context, which is now a union.
This is the pid to be manipulated rather than the /proc/mm file
descriptor. Code which deals with this now checks proc_mm to see whether
it should use the usual skas code or the new code.
- userspace_tramp is now used to create a new host process for every UML
process, rather than one per UML processor. It checks proc_mm and
ptrace_faultinfo to decide whether to map in the pages above its stack.
- start_userspace now makes CLONE_VM conditional on proc_mm since we need
separate address spaces now.
- switch_mm_skas now just sets userspace_pid[0] to the new pid rather
than PTRACE_SWITCH_MM. There is an addition to userspace which updates
its idea of the pid being manipulated each time around the loop. This is
important on exec, when the pid will change underneath userspace().
- The stub page has a pte, but it can't be mapped in using tlb_flush
because it is part of tlb_flush. This is why it's required for it to be
mapped in by userspace_tramp.
Other random things:
- The stub section in uml.lds.S is page aligned. This page is written
out to the backing vm file in setup_physmem because it is mapped from
there into user processes.
- There's some confusion with TASK_SIZE now that there are a couple of
extra pages that the process can't use. TASK_SIZE is considered by the
elf code to be the usable process memory, which is reasonable, so it is
decreased by two pages. This confuses the definition of
USER_PGDS_IN_LAST_PML4, making it too small because of the rounding down
of the uneven division. So we round it to the nearest PGDIR_SIZE rather
than the lower one.
- I added a missing PT_SYSCALL_ARG6_OFFSET macro.
- um_mmu.h was made into a userspace-usable file.
- proc_mm and ptrace_faultinfo are globals which say whether the host
supports these features.
- There is a bad interaction between the mm.nr_ptes check at the end of
exit_mmap, stack randomization, and skas0. exit_mmap will stop freeing
pages at the PGDIR_SIZE boundary after the last vma. If the stack isn't
on the last page table page, the last pte page won't be freed, as it
should be since the stub ptes are there, and exit_mmap will BUG because
there is an unfreed page. To get around this, TASK_SIZE is set to the
next lowest PGDIR_SIZE boundary and mm->nr_ptes is decremented after the
calls to init_stub_pte. This ensures that we know the process stack (and
all other process mappings) will be below the top page table page, and
thus we know that mm->nr_ptes will be one too many, and can be
decremented.
Things that need fixing:
- We may need better assurrences that the stub code is PIC.
- The stub pte is set up in init_new_context_skas.
- alloc_pgdir is probably the right place.
Signed-off-by: Jeff Dike <jdike@addtoit.com>
Signed-off-by: Andrew Morton <akpm@osdl.org>
Signed-off-by: Linus Torvalds <torvalds@osdl.org>
2005-07-08 07:56:49 +07:00
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2008-05-13 04:01:56 +07:00
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. = ALIGN(PAGE_SIZE);
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2005-04-17 05:20:36 +07:00
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} =0x90909090
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2008-05-13 04:01:56 +07:00
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. = ALIGN(PAGE_SIZE);
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2007-08-31 13:56:17 +07:00
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.syscall_stub : {
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__syscall_stub_start = .;
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*(.__syscall_stub*)
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__syscall_stub_end = .;
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}
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2005-04-17 05:20:36 +07:00
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.fini : {
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KEEP (*(.fini))
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} =0x90909090
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.kstrtab : { *(.kstrtab) }
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2012-10-08 09:27:32 +07:00
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#include <asm/common.lds.S>
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2005-04-17 05:20:36 +07:00
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2013-07-04 05:03:40 +07:00
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__init_begin = .;
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2008-01-20 20:15:03 +07:00
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init.data : { INIT_DATA }
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2013-07-04 05:03:40 +07:00
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__init_end = .;
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2005-04-17 05:20:36 +07:00
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/* Ensure the __preinit_array_start label is properly aligned. We
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could instead move the label definition inside the section, but
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the linker would then create the section even if it turns out to
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be empty, which isn't pretty. */
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. = ALIGN(32 / 8);
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.preinit_array : { *(.preinit_array) }
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.fini_array : { *(.fini_array) }
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.data : {
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2009-09-24 21:36:20 +07:00
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INIT_TASK_DATA(KERNEL_STACK_SIZE)
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uml: iRQ stacks
Add a separate IRQ stack. This differs from i386 in having the entire
interrupt run on a separate stack rather than starting on the normal kernel
stack and switching over once some preparation has been done. The underlying
mechanism, is of course, sigaltstack.
Another difference is that interrupts that happen in userspace are handled on
the normal kernel stack. These cause a wait wakeup instead of a signal
delivery so there is no point in trying to switch stacks for these. There's
no other stuff on the stack, so there is no extra stack consumption.
This quirk makes it possible to have the entire interrupt run on a separate
stack - process preemption (and calls to schedule()) happens on a normal
kernel stack. If we enable CONFIG_PREEMPT, this will need to be rethought.
The IRQ stack for CPU 0 is declared in the same way as the initial kernel
stack. IRQ stacks for other CPUs will be allocated dynamically.
An extra field was added to the thread_info structure. When the active
thread_info is copied to the IRQ stack, the real_thread field points back to
the original stack. This makes it easy to tell where to copy the thread_info
struct back to when the interrupt is finished. It also serves as a marker of
a nested interrupt. It is NULL for the first interrupt on the stack, and
non-NULL for any nested interrupts.
Care is taken to behave correctly if a second interrupt comes in when the
thread_info structure is being set up or taken down. I could just disable
interrupts here, but I don't feel like giving up any of the performance gained
by not flipping signals on and off.
If an interrupt comes in during these critical periods, the handler can't run
because it has no idea what shape the stack is in. So, it sets a bit for its
signal in a global mask and returns. The outer handler will deal with this
signal itself.
Atomicity is had with xchg. A nested interrupt that needs to bail out will
xchg its signal mask into pending_mask and repeat in case yet another
interrupt hit at the same time, until the mask stabilizes.
The outermost interrupt will set up the thread_info and xchg a zero into
pending_mask when it is done. At this point, nested interrupts will look at
->real_thread and see that no setup needs to be done. They can just continue
normally.
Similar care needs to be taken when exiting the outer handler. If another
interrupt comes in while it is copying the thread_info, it will drop a bit
into pending_mask. The outer handler will check this and if it is non-zero,
will loop, set up the stack again, and handle the interrupt.
Signed-off-by: Jeff Dike <jdike@linux.intel.com>
Cc: Paolo 'Blaisorblade' Giarrusso <blaisorblade@yahoo.it>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2007-05-11 12:22:34 +07:00
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. = ALIGN(KERNEL_STACK_SIZE);
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2010-02-20 07:03:41 +07:00
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*(.data..init_irqstack)
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2007-05-17 18:38:44 +07:00
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DATA_DATA
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*(.data.* .gnu.linkonce.d.*)
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2005-04-17 05:20:36 +07:00
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SORT(CONSTRUCTORS)
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}
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.data1 : { *(.data1) }
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.tdata : { *(.tdata .tdata.* .gnu.linkonce.td.*) }
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.tbss : { *(.tbss .tbss.* .gnu.linkonce.tb.*) *(.tcommon) }
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.eh_frame : { KEEP (*(.eh_frame)) }
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.gcc_except_table : { *(.gcc_except_table) }
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.dynamic : { *(.dynamic) }
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.ctors : {
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/* gcc uses crtbegin.o to find the start of
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the constructors, so we make sure it is
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first. Because this is a wildcard, it
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doesn't matter if the user does not
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actually link against crtbegin.o; the
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linker won't look for a file to match a
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wildcard. The wildcard also means that it
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doesn't matter which directory crtbegin.o
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is in. */
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KEEP (*crtbegin.o(.ctors))
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/* We don't want to include the .ctor section from
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from the crtend.o file until after the sorted ctors.
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The .ctor section from the crtend file contains the
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end of ctors marker and it must be last */
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KEEP (*(EXCLUDE_FILE (*crtend.o ) .ctors))
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KEEP (*(SORT(.ctors.*)))
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KEEP (*(.ctors))
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}
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.dtors : {
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KEEP (*crtbegin.o(.dtors))
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KEEP (*(EXCLUDE_FILE (*crtend.o ) .dtors))
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KEEP (*(SORT(.dtors.*)))
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KEEP (*(.dtors))
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}
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.jcr : { KEEP (*(.jcr)) }
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.got : { *(.got.plt) *(.got) }
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_edata = .;
|
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PROVIDE (edata = .);
|
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.bss : {
|
2007-08-31 13:56:17 +07:00
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|
|
__bss_start = .;
|
2005-04-17 05:20:36 +07:00
|
|
|
*(.dynbss)
|
|
|
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|
*(.bss .bss.* .gnu.linkonce.b.*)
|
|
|
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*(COMMON)
|
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/* Align here to ensure that the .bss section occupies space up to
|
|
|
|
|
_end. Align after .bss to ensure correct alignment even if the
|
|
|
|
|
.bss section disappears because there are no input sections. */
|
|
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|
. = ALIGN(32 / 8);
|
|
|
|
|
. = ALIGN(32 / 8);
|
|
|
|
|
}
|
2013-07-04 05:03:40 +07:00
|
|
|
__bss_stop = .;
|
2005-04-17 05:20:36 +07:00
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|
|
_end = .;
|
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|
|
PROVIDE (end = .);
|
2005-09-11 00:44:54 +07:00
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|
|
|
|
|
|
|
STABS_DEBUG
|
|
|
|
|
|
|
|
|
|
DWARF_DEBUG
|
2009-06-24 13:13:38 +07:00
|
|
|
|
linker script: unify usage of discard definition
Discarded sections in different archs share some commonality but have
considerable differences. This led to linker script for each arch
implementing its own /DISCARD/ definition, which makes maintaining
tedious and adding new entries error-prone.
This patch makes all linker scripts to move discard definitions to the
end of the linker script and use the common DISCARDS macro. As ld
uses the first matching section definition, archs can include default
discarded sections by including them earlier in the linker script.
ia64 is notable because it first throws away some ia64 specific
subsections and then include the rest of the sections into the final
image, so those sections must be discarded before the inclusion.
defconfig compile tested for x86, x86-64, powerpc, powerpc64, ia64,
alpha, sparc, sparc64 and s390. Michal Simek tested microblaze.
Signed-off-by: Tejun Heo <tj@kernel.org>
Acked-by: Paul Mundt <lethal@linux-sh.org>
Acked-by: Mike Frysinger <vapier@gentoo.org>
Tested-by: Michal Simek <monstr@monstr.eu>
Cc: linux-arch@vger.kernel.org
Cc: Michal Simek <monstr@monstr.eu>
Cc: microblaze-uclinux@itee.uq.edu.au
Cc: Sam Ravnborg <sam@ravnborg.org>
Cc: Tony Luck <tony.luck@intel.com>
2009-07-09 09:27:40 +07:00
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DISCARDS
|
2005-04-17 05:20:36 +07:00
|
|
|
}
|