Subversion Repositories or1k_soc_on_altera_embedded_dev_kit

     Kernel level exception handling in Linux 2.1.8

  Commentary by Joerg Pommnitz 

When a process runs in kernel mode, it often has to access user

mode memory whose address has been passed by an untrusted program.

To protect itself the kernel has to verify this address.

In older versions of Linux this was done with the

int verify_area(int type, const void * addr, unsigned long size)

function (which has since been replaced by access_ok()).

This function verified that the memory area starting at address

'addr' and of size 'size' was accessible for the operation specified

in type (read or write). To do this, verify_read had to look up the

virtual memory area (vma) that contained the address addr. In the

normal case (correctly working program), this test was successful.

It only failed for a few buggy programs. In some kernel profiling

tests, this normally unneeded verification used up a considerable

amount of time.

To overcome this situation, Linus decided to let the virtual memory

hardware present in every Linux-capable CPU handle this test.

How does this work?

Whenever the kernel tries to access an address that is currently not

accessible, the CPU generates a page fault exception and calls the

page fault handler

void do_page_fault(struct pt_regs *regs, unsigned long error_code)

in arch/i386/mm/fault.c. The parameters on the stack are set up by

the low level assembly glue in arch/i386/kernel/entry.S. The parameter

regs is a pointer to the saved registers on the stack, error_code

contains a reason code for the exception.

do_page_fault first obtains the unaccessible address from the CPU

control register CR2. If the address is within the virtual address

space of the process, the fault probably occurred, because the page

was not swapped in, write protected or something similar. However,

we are interested in the other case: the address is not valid, there

is no vma that contains this address. In this case, the kernel jumps

to the bad_area label.

There it uses the address of the instruction that caused the exception

(i.e. regs->eip) to find an address where the execution can continue

(fixup). If this search is successful, the fault handler modifies the

return address (again regs->eip) and returns. The execution will

continue at the address in fixup.

Where does fixup point to?

Since we jump to the contents of fixup, fixup obviously points

to executable code. This code is hidden inside the user access macros.

I have picked the get_user macro defined in include/asm/uaccess.h as an

example. The definition is somewhat hard to follow, so let's peek at

the code generated by the preprocessor and the compiler. I selected

the get_user call in drivers/char/console.c for a detailed examination.

The original code in console.c line 1405:

        get_user(c, buf);

The preprocessor output (edited to become somewhat readable):

(

  {

    long __gu_err = - 14 , __gu_val = 0;

    const __typeof__(*( (  buf ) )) *__gu_addr = ((buf));

    if (((((0 + current_set[0])->tss.segment) == 0x18 )  ||

       (((sizeof(*(buf))) <= 0xC0000000UL) &&

       ((unsigned long)(__gu_addr ) <= 0xC0000000UL - (sizeof(*(buf)))))))

      do {

        __gu_err  = 0;

        switch ((sizeof(*(buf)))) {

          case 1:

            __asm__ __volatile__(

              "1:      mov" "b" " %2,%" "b" "1\n"

              "2:\n"

              ".section .fixup,\"ax\"\n"

              "3:      movl %3,%0\n"

              "        xor" "b" " %" "b" "1,%" "b" "1\n"

              "        jmp 2b\n"

              ".section __ex_table,\"a\"\n"

              "        .align 4\n"

              "        .long 1b,3b\n"

              ".text"        : "=r"(__gu_err), "=q" (__gu_val): "m"((*(struct __large_struct *)

                            (   __gu_addr   )) ), "i"(- 14 ), "0"(  __gu_err  )) ;

              break;

          case 2:

            __asm__ __volatile__(

              "1:      mov" "w" " %2,%" "w" "1\n"

              "2:\n"

              ".section .fixup,\"ax\"\n"

              "3:      movl %3,%0\n"

              "        xor" "w" " %" "w" "1,%" "w" "1\n"

              "        jmp 2b\n"

              ".section __ex_table,\"a\"\n"

              "        .align 4\n"

              "        .long 1b,3b\n"

              ".text"        : "=r"(__gu_err), "=r" (__gu_val) : "m"((*(struct __large_struct *)

                            (   __gu_addr   )) ), "i"(- 14 ), "0"(  __gu_err  ));

              break;

          case 4:

            __asm__ __volatile__(

              "1:      mov" "l" " %2,%" "" "1\n"

              "2:\n"

              ".section .fixup,\"ax\"\n"

              "3:      movl %3,%0\n"

              "        xor" "l" " %" "" "1,%" "" "1\n"

              "        jmp 2b\n"

              ".section __ex_table,\"a\"\n"

              "        .align 4\n"        "        .long 1b,3b\n"

              ".text"        : "=r"(__gu_err), "=r" (__gu_val) : "m"((*(struct __large_struct *)

                            (   __gu_addr   )) ), "i"(- 14 ), "0"(__gu_err));

              break;

          default:

            (__gu_val) = __get_user_bad();

        }

      } while (0) ;

    ((c)) = (__typeof__(*((buf))))__gu_val;

    __gu_err;

  }

);

WOW! Black GCC/assembly magic. This is impossible to follow, so let's

see what code gcc generates:

 >         xorl %edx,%edx

 >         movl current_set,%eax

 >         cmpl $24,788(%eax)

 >         je .L1424

 >         cmpl $-1073741825,64(%esp)

 >         ja .L1423

 > .L1424:

 >         movl %edx,%eax

 >         movl 64(%esp),%ebx

 > #APP

 > 1:      movb (%ebx),%dl                /* this is the actual user access */

 > 2:

 > .section .fixup,"ax"

 > 3:      movl $-14,%eax

 >         xorb %dl,%dl

 >         jmp 2b

 > .section __ex_table,"a"

 >         .align 4

 >         .long 1b,3b

 > .text

 > #NO_APP

 > .L1423:

 >         movzbl %dl,%esi

The optimizer does a good job and gives us something we can actually

understand. Can we? The actual user access is quite obvious. Thanks

to the unified address space we can just access the address in user

memory. But what does the .section stuff do?????

To understand this we have to look at the final kernel:

 > objdump --section-headers vmlinux

 >

 > vmlinux:     file format elf32-i386

 >

 > Sections:

 > Idx Name          Size      VMA       LMA       File off  Algn

 >   0 .text         00098f40  c0100000  c0100000  00001000  2**4

 >                   CONTENTS, ALLOC, LOAD, READONLY, CODE

 >   1 .fixup        000016bc  c0198f40  c0198f40  00099f40  2**0

 >                   CONTENTS, ALLOC, LOAD, READONLY, CODE

 >   2 .rodata       0000f127  c019a5fc  c019a5fc  0009b5fc  2**2

 >                   CONTENTS, ALLOC, LOAD, READONLY, DATA

 >   3 __ex_table    000015c0  c01a9724  c01a9724  000aa724  2**2

 >                   CONTENTS, ALLOC, LOAD, READONLY, DATA

 >   4 .data         0000ea58  c01abcf0  c01abcf0  000abcf0  2**4

 >                   CONTENTS, ALLOC, LOAD, DATA

 >   5 .bss          00018e21  c01ba748  c01ba748  000ba748  2**2

 >                   ALLOC

 >   6 .comment      00000ec4  00000000  00000000  000ba748  2**0

 >                   CONTENTS, READONLY

 >   7 .note         00001068  00000ec4  00000ec4  000bb60c  2**0

 >                   CONTENTS, READONLY

There are obviously 2 non standard ELF sections in the generated object

file. But first we want to find out what happened to our code in the

final kernel executable:

 > objdump --disassemble --section=.text vmlinux

 >

 > c017e785  xorl   %edx,%edx

 > c017e787  movl   0xc01c7bec,%eax

 > c017e78c  cmpl   $0x18,0x314(%eax)

 > c017e793  je     c017e79f 

 > c017e795  cmpl   $0xbfffffff,0x40(%esp,1)

 > c017e79d  ja     c017e7a7 

 > c017e79f  movl   %edx,%eax

 > c017e7a1  movl   0x40(%esp,1),%ebx

 > c017e7a5  movb   (%ebx),%dl

 > c017e7a7  movzbl %dl,%esi

The whole user memory access is reduced to 10 x86 machine instructions.

The instructions bracketed in the .section directives are no longer

in the normal execution path. They are located in a different section

of the executable file:

 > objdump --disassemble --section=.fixup vmlinux

 >

 > c0199ff5 <.fixup+10b5> movl   $0xfffffff2,%eax

 > c0199ffa <.fixup+10ba> xorb   %dl,%dl

 > c0199ffc <.fixup+10bc> jmp    c017e7a7 

And finally:

 > objdump --full-contents --section=__ex_table vmlinux

 >

 >  c01aa7c4 93c017c0 e09f19c0 97c017c0 99c017c0  ................

 >  c01aa7d4 f6c217c0 e99f19c0 a5e717c0 f59f19c0  ................

 >  c01aa7e4 080a18c0 01a019c0 0a0a18c0 04a019c0  ................

or in human readable byte order:

 >  c01aa7c4 c017c093 c0199fe0 c017c097 c017c099  ................

 >  c01aa7d4 c017c2f6 c0199fe9 c017e7a5 c0199ff5  ................

                               ^^^^^^^^^^^^^^^^^

                               this is the interesting part!

 >  c01aa7e4 c0180a08 c019a001 c0180a0a c019a004  ................

What happened? The assembly directives

.section .fixup,"ax"

.section __ex_table,"a"

told the assembler to move the following code to the specified

sections in the ELF object file. So the instructions

3:      movl $-14,%eax

        xorb %dl,%dl

        jmp 2b

ended up in the .fixup section of the object file and the addresses

        .long 1b,3b

ended up in the __ex_table section of the object file. 1b and 3b

are local labels. The local label 1b (1b stands for next label 1

backward) is the address of the instruction that might fault, i.e.

in our case the address of the label 1 is c017e7a5:

the original assembly code: > 1:      movb (%ebx),%dl

and linked in vmlinux     : > c017e7a5  movb   (%ebx),%dl

The local label 3 (backwards again) is the address of the code to handle

the fault, in our case the actual value is c0199ff5:

the original assembly code: > 3:      movl $-14,%eax

and linked in vmlinux     : > c0199ff5 <.fixup+10b5> movl   $0xfffffff2,%eax

The assembly code

 > .section __ex_table,"a"

 >         .align 4

 >         .long 1b,3b

becomes the value pair

 >  c01aa7d4 c017c2f6 c0199fe9 c017e7a5 c0199ff5  ................

                               ^this is ^this is

                               1b       3b

c017e7a5,c0199ff5 in the exception table of the kernel.

So, what actually happens if a fault from kernel mode with no suitable

vma occurs?

1.) access to invalid address:

 > c017e7a5  movb   (%ebx),%dl

2.) MMU generates exception

3.) CPU calls do_page_fault

4.) do page fault calls search_exception_table (regs->eip == c017e7a5);

5.) search_exception_table looks up the address c017e7a5 in the

    exception table (i.e. the contents of the ELF section __ex_table)

    and returns the address of the associated fault handle code c0199ff5.

6.) do_page_fault modifies its own return address to point to the fault

    handle code and returns.

7.) execution continues in the fault handling code.

8.) 8a) EAX becomes -EFAULT (== -14)

    8b) DL  becomes zero (the value we "read" from user space)

    8c) execution continues at local label 2 (address of the

        instruction immediately after the faulting user access).

The steps 8a to 8c in a certain way emulate the faulting instruction.

That's it, mostly. If you look at our example, you might ask why

we set EAX to -EFAULT in the exception handler code. Well, the

get_user macro actually returns a value: 0, if the user access was

successful, -EFAULT on failure. Our original code did not test this

return value, however the inline assembly code in get_user tries to

return -EFAULT. GCC selected EAX to return this value.

NOTE:

Due to the way that the exception table is built and needs to be ordered,

only use exceptions for code in the .text section.  Any other section

will cause the exception table to not be sorted correctly, and the

exceptions will fail.