Linux Socket Filtering aka Berkeley Packet Filter (BPF)
Introduction
Linux Socket Filtering (LSF) is derived from the Berkeley Packet Filter.
Though there are some distinct differences between the BSD and Linux
Kernel filtering, but when we speak of BPF or LSF in Linux context, we
mean the very same mechanism of filtering in the Linux kernel.
BPF allows a user-space program to attach a filter onto any socket and
allow or disallow certain types of data to come through the socket. LSF
follows exactly the same filter code structure as BSD’s BPF, so referring
to the BSD bpf.4 manpage is very helpful in creating filters.
On Linux, BPF is much simpler than on BSD. One does not have to worry
about devices or anything like that. You simply create your filter code,
send it to the kernel via the SO_ATTACH_FILTER option and if your filter
code passes the kernel check on it, you then immediately begin filtering
data on that socket.
You can also detach filters from your socket via the SO_DETACH_FILTER
option. This will probably not be used much since when you close a socket
that has a filter on it the filter is automagically removed. The other
less common case may be adding a different filter on the same socket where
you had another filter that is still running: the kernel takes care of
removing the old one and placing your new one in its place, assuming your
filter has passed the checks, otherwise if it fails the old filter will
remain on that socket.
SO_LOCK_FILTER option allows to lock the filter attached to a socket. Once
set, a filter cannot be removed or changed. This allows one process to
setup a socket, attach a filter, lock it then drop privileges and be
assured that the filter will be kept until the socket is closed.
The biggest user of this construct might be libpcap. Issuing a high-level
filter command like tcpdump -i em1 port 22 passes through the libpcap
internal compiler that generates a structure that can eventually be loaded
via SO_ATTACH_FILTER to the kernel. tcpdump -i em1 port 22 -ddd
displays what is being placed into this structure.
Although we were only speaking about sockets here, BPF in Linux is used
in many more places. There’s xt_bpf for netfilter, cls_bpf in the kernel
qdisc layer, SECCOMP-BPF (SECure COMPuting [1]), and lots of other places
such as team driver, PTP code, etc where BPF is being used.
[1] Documentation/userspace-api/seccomp_filter.rst
Original BPF paper:
Steven McCanne and Van Jacobson. 1993. The BSD packet filter: a new
architecture for user-level packet capture. In Proceedings of the
USENIX Winter 1993 Conference Proceedings on USENIX Winter 1993
Conference Proceedings (USENIX’93). USENIX Association, Berkeley,
CA, USA, 2-2. [http://www.tcpdump.org/papers/bpf-usenix93.pdf]
Structure
User space applications include <linux/filter.h> which contains the
following relevant structures:
struct sock_filter { /* Filter block /
__u16 code; / Actual filter code /
__u8 jt; / Jump true /
__u8 jf; / Jump false /
__u32 k; / Generic multiuse field */
};
Such a structure is assembled as an array of 4-tuples, that contains
a code, jt, jf and k value. jt and jf are jump offsets and k a generic
value to be used for a provided code.
struct sock_fprog { /* Required for SO_ATTACH_FILTER. /
unsigned short len; / Number of filter blocks */
struct sock_filter __user *filter;
};
For socket filtering, a pointer to this structure (as shown in
follow-up example) is being passed to the kernel through setsockopt(2).
Example
#include <sys/socket.h>
#include <sys/types.h>
#include <arpa/inet.h>
#include <linux/if_ether.h>
/* … */
/* From the example above: tcpdump -i em1 port 22 -dd */
struct sock_filter code[] = {
{ 0x28, 0, 0, 0x0000000c },
{ 0x15, 0, 8, 0x000086dd },
{ 0x30, 0, 0, 0x00000014 },
{ 0x15, 2, 0, 0x00000084 },
{ 0x15, 1, 0, 0x00000006 },
{ 0x15, 0, 17, 0x00000011 },
{ 0x28, 0, 0, 0x00000036 },
{ 0x15, 14, 0, 0x00000016 },
{ 0x28, 0, 0, 0x00000038 },
{ 0x15, 12, 13, 0x00000016 },
{ 0x15, 0, 12, 0x00000800 },
{ 0x30, 0, 0, 0x00000017 },
{ 0x15, 2, 0, 0x00000084 },
{ 0x15, 1, 0, 0x00000006 },
{ 0x15, 0, 8, 0x00000011 },
{ 0x28, 0, 0, 0x00000014 },
{ 0x45, 6, 0, 0x00001fff },
{ 0xb1, 0, 0, 0x0000000e },
{ 0x48, 0, 0, 0x0000000e },
{ 0x15, 2, 0, 0x00000016 },
{ 0x48, 0, 0, 0x00000010 },
{ 0x15, 0, 1, 0x00000016 },
{ 0x06, 0, 0, 0x0000ffff },
{ 0x06, 0, 0, 0x00000000 },
};
struct sock_fprog bpf = {
.len = ARRAY_SIZE(code),
.filter = code,
};
sock = socket(PF_PACKET, SOCK_RAW, htons(ETH_P_ALL));
if (sock < 0)
/* … bail out … */
ret = setsockopt(sock, SOL_SOCKET, SO_ATTACH_FILTER, &bpf, sizeof(bpf));
if (ret < 0)
/* … bail out … */
/* … */
close(sock);
The above example code attaches a socket filter for a PF_PACKET socket
in order to let all IPv4/IPv6 packets with port 22 pass. The rest will
be dropped for this socket.
The setsockopt(2) call to SO_DETACH_FILTER doesn’t need any arguments
and SO_LOCK_FILTER for preventing the filter to be detached, takes an
integer value with 0 or 1.
Note that socket filters are not restricted to PF_PACKET sockets only,
but can also be used on other socket families.
Summary of system calls:
- setsockopt(sockfd, SOL_SOCKET, SO_ATTACH_FILTER, &val, sizeof(val));
- setsockopt(sockfd, SOL_SOCKET, SO_DETACH_FILTER, &val, sizeof(val));
- setsockopt(sockfd, SOL_SOCKET, SO_LOCK_FILTER, &val, sizeof(val));
Normally, most use cases for socket filtering on packet sockets will be
covered by libpcap in high-level syntax, so as an application developer
you should stick to that. libpcap wraps its own layer around all that.
Unless i) using/linking to libpcap is not an option, ii) the required BPF
filters use Linux extensions that are not supported by libpcap’s compiler,
iii) a filter might be more complex and not cleanly implementable with
libpcap’s compiler, or iv) particular filter codes should be optimized
differently than libpcap’s internal compiler does; then in such cases
writing such a filter “by hand” can be of an alternative. For example,
xt_bpf and cls_bpf users might have requirements that could result in
more complex filter code, or one that cannot be expressed with libpcap
(e.g. different return codes for various code paths). Moreover, BPF JIT
implementors may wish to manually write test cases and thus need low-level
access to BPF code as well.
BPF engine and instruction set
Under tools/bpf/ there’s a small helper tool called bpf_asm which can
be used to write low-level filters for example scenarios mentioned in the
previous section. Asm-like syntax mentioned here has been implemented in
bpf_asm and will be used for further explanations (instead of dealing with
less readable opcodes directly, principles are the same). The syntax is
closely modelled after Steven McCanne’s and Van Jacobson’s BPF paper.
The BPF architecture consists of the following basic elements:
Element Description
A 32 bit wide accumulator
X 32 bit wide X register
M[] 16 x 32 bit wide misc registers aka “scratch memory
store”, addressable from 0 to 15
A program, that is translated by bpf_asm into “opcodes” is an array that
consists of the following elements (as already mentioned):
op:16, jt:8, jf:8, k:32
The element op is a 16 bit wide opcode that has a particular instruction
encoded. jt and jf are two 8 bit wide jump targets, one for condition
“jump if true”, the other one “jump if false”. Eventually, element k
contains a miscellaneous argument that can be interpreted in different
ways depending on the given instruction in op.
The instruction set consists of load, store, branch, alu, miscellaneous
and return instructions that are also represented in bpf_asm syntax. This
table lists all bpf_asm instructions available resp. what their underlying
opcodes as defined in linux/filter.h stand for:
Instruction Addressing mode Description
ld 1, 2, 3, 4, 10 Load word into A
ldi 4 Load word into A
ldh 1, 2 Load half-word into A
ldb 1, 2 Load byte into A
ldx 3, 4, 5, 10 Load word into X
ldxi 4 Load word into X
ldxb 5 Load byte into X
st 3 Store A into M[]
stx 3 Store X into M[]
jmp 6 Jump to label
ja 6 Jump to label
jeq 7, 8 Jump on A == k
jneq 8 Jump on A != k
jne 8 Jump on A != k
jlt 8 Jump on A < k
jle 8 Jump on A <= k
jgt 7, 8 Jump on A > k
jge 7, 8 Jump on A >= k
jset 7, 8 Jump on A & k
add 0, 4 A +
sub 0, 4 A -
mul 0, 4 A *
div 0, 4 A /
mod 0, 4 A %
neg !A
and 0, 4 A &
or 0, 4 A |
xor 0, 4 A ^
lsh 0, 4 A <<
rsh 0, 4 A >>
tax Copy A into X
txa Copy X into A
ret 4, 9 Return
The next table shows addressing formats from the 2nd column:
Addressing mode Syntax Description
0 x/%x Register X
1 [k] BHW at byte offset k in the packet
2 [x + k] BHW at the offset X + k in the packet
3 M[k] Word at offset k in M[]
4 #k Literal value stored in k
5 4*([k]&0xf) Lower nibble * 4 at byte offset k in the packet
6 L Jump label L
7 #k,Lt,Lf Jump to Lt if true, otherwise jump to Lf
8 #k,Lt Jump to Lt if predicate is true
9 a/%a Accumulator A
10 extension BPF extension
The Linux kernel also has a couple of BPF extensions that are used along
with the class of load instructions by “overloading” the k argument with
a negative offset + a particular extension offset. The result of such BPF
extensions are loaded into A.
Possible BPF extensions are shown in the following table:
Extension Description
len skb->len
proto skb->protocol
type skb->pkt_type
poff Payload start offset
ifidx skb->dev->ifindex
nla Netlink attribute of type X with offset A
nlan Nested Netlink attribute of type X with offset A
mark skb->mark
queue skb->queue_mapping
hatype skb->dev->type
rxhash skb->hash
cpu raw_smp_processor_id()
vlan_tci skb_vlan_tag_get(skb)
vlan_avail skb_vlan_tag_present(skb)
vlan_tpid skb->vlan_proto
rand prandom_u32()
These extensions can also be prefixed with ‘#’.
Examples for low-level BPF:
** ARP packets:
ldh [12]
jne #0x806, drop
ret #-1
drop: ret #0
** IPv4 TCP packets:
ldh [12]
jne #0x800, drop
ldb [23]
jneq #6, drop
ret #-1
drop: ret #0
** (Accelerated) VLAN w/ id 10:
ld vlan_tci
jneq #10, drop
ret #-1
drop: ret #0
** icmp random packet sampling, 1 in 4
ldh [12]
jne #0x800, drop
ldb [23]
jneq #1, drop
get a random uint32 number
ld rand
mod #4
jneq #1, drop
ret #-1
drop: ret #0
** SECCOMP filter example:
ld [4] /* offsetof(struct seccomp_data, arch) /
jne #0xc000003e, bad / AUDIT_ARCH_X86_64 /
ld [0] / offsetof(struct seccomp_data, nr) /
jeq #15, good / __NR_rt_sigreturn /
jeq #231, good / __NR_exit_group /
jeq #60, good / __NR_exit /
jeq #0, good / __NR_read /
jeq #1, good / __NR_write /
jeq #5, good / __NR_fstat /
jeq #9, good / __NR_mmap /
jeq #14, good / __NR_rt_sigprocmask /
jeq #13, good / __NR_rt_sigaction /
jeq #35, good / __NR_nanosleep /
bad: ret #0 / SECCOMP_RET_KILL_THREAD /
good: ret #0x7fff0000 / SECCOMP_RET_ALLOW */
The above example code can be placed into a file (here called “foo”), and
then be passed to the bpf_asm tool for generating opcodes, output that xt_bpf
and cls_bpf understands and can directly be loaded with. Example with above
ARP code:
$ ./bpf_asm foo
4,40 0 0 12,21 0 1 2054,6 0 0 4294967295,6 0 0 0,
In copy and paste C-like output:
$ ./bpf_asm -c foo
{ 0x28, 0, 0, 0x0000000c },
{ 0x15, 0, 1, 0x00000806 },
{ 0x06, 0, 0, 0xffffffff },
{ 0x06, 0, 0, 0000000000 },
In particular, as usage with xt_bpf or cls_bpf can result in more complex BPF
filters that might not be obvious at first, it’s good to test filters before
attaching to a live system. For that purpose, there’s a small tool called
bpf_dbg under tools/bpf/ in the kernel source directory. This debugger allows
for testing BPF filters against given pcap files, single stepping through the
BPF code on the pcap’s packets and to do BPF machine register dumps.
Starting bpf_dbg is trivial and just requires issuing:
./bpf_dbg
In case input and output do not equal stdin/stdout, bpf_dbg takes an
alternative stdin source as a first argument, and an alternative stdout
sink as a second one, e.g. ./bpf_dbg test_in.txt test_out.txt.
Other than that, a particular libreadline configuration can be set via
file “/.bpf_dbg_init” and the command history is stored in the file/.bpf_dbg_history”.
“
Interaction in bpf_dbg happens through a shell that also has auto-completion
support (follow-up example commands starting with ‘>’ denote bpf_dbg shell).
The usual workflow would be to …
load bpf 6,40 0 0 12,21 0 3 2048,48 0 0 23,21 0 1 1,6 0 0 65535,6 0 0 0
Loads a BPF filter from standard output of bpf_asm, or transformed via
e.g.tcpdump -iem1 -ddd port 22 | tr '\n' ','. Note that for JIT
debugging (next section), this command creates a temporary socket and
loads the BPF code into the kernel. Thus, this will also be useful for
JIT developers.
load pcap foo.pcap
Loads standard tcpdump pcap file.
run [
]
bpf passes:1 fails:9
Runs through all packets from a pcap to account how many passes and fails
the filter will generate. A limit of packets to traverse can be given.
disassemble
l0: ldh [12]
l1: jeq #0x800, l2, l5
l2: ldb [23]
l3: jeq #0x1, l4, l5
l4: ret #0xffff
l5: ret #0
Prints out BPF code disassembly.
dump
/* { op, jt, jf, k }, */
{ 0x28, 0, 0, 0x0000000c },
{ 0x15, 0, 3, 0x00000800 },
{ 0x30, 0, 0, 0x00000017 },
{ 0x15, 0, 1, 0x00000001 },
{ 0x06, 0, 0, 0x0000ffff },
{ 0x06, 0, 0, 0000000000 },
Prints out C-style BPF code dump.
breakpoint 0
breakpoint at: l0: ldh [12]
breakpoint 1
breakpoint at: l1: jeq #0x800, l2, l5
…
Sets breakpoints at particular BPF instructions. Issuing aruncommand
will walk through the pcap file continuing from the current packet and
break when a breakpoint is being hit (anotherrunwill continue from
the currently active breakpoint executing next instructions):
run
– register dump –
pc: [0] <– program counter
code: [40] jt[0] jf[0] k[12] <– plain BPF code of current instruction
curr: l0: ldh [12] <– disassembly of current instruction
A: [00000000][0] <– content of A (hex, decimal)
X: [00000000][0] <– content of X (hex, decimal)
M[0,15]: [00000000][0] <– folded content of M (hex, decimal)
– packet dump – <– Current packet from pcap (hex)
len: 42
0: 00 19 cb 55 55 a4 00 14 a4 43 78 69 08 06 00 01
16: 08 00 06 04 00 01 00 14 a4 43 78 69 0a 3b 01 26
32: 00 00 00 00 00 00 0a 3b 01 01
(breakpoint)
breakpoint
breakpoints: 0 1
Prints currently set breakpoints.
step [-
, + ]
Performs single stepping through the BPF program from the current pc
offset. Thus, on each step invocation, above register dump is issued.
This can go forwards and backwards in time, a plainstepwill break
on the next BPF instruction, thus +1. (Norunneeds to be issued here.)
select
Selects a given packet from the pcap file to continue from. Thus, on
the nextrunorstep, the BPF program is being evaluated against
the user pre-selected packet. Numbering starts just as in Wireshark
with index 1.
quit
#
Exits bpf_dbg.
JIT compiler
The Linux kernel has a built-in BPF JIT compiler for x86_64, SPARC, PowerPC,
ARM, ARM64, MIPS and s390 and can be enabled through CONFIG_BPF_JIT. The JIT
compiler is transparently invoked for each attached filter from user space
or for internal kernel users if it has been previously enabled by root:
echo 1 > /proc/sys/net/core/bpf_jit_enable
For JIT developers, doing audits etc, each compile run can output the generated
opcode image into the kernel log via:
echo 2 > /proc/sys/net/core/bpf_jit_enable
Example output from dmesg:
[ 3389.935842] flen=6 proglen=70 pass=3 image=ffffffffa0069c8f
[ 3389.935847] JIT code: 00000000: 55 48 89 e5 48 83 ec 60 48 89 5d f8 44 8b 4f 68
[ 3389.935849] JIT code: 00000010: 44 2b 4f 6c 4c 8b 87 d8 00 00 00 be 0c 00 00 00
[ 3389.935850] JIT code: 00000020: e8 1d 94 ff e0 3d 00 08 00 00 75 16 be 17 00 00
[ 3389.935851] JIT code: 00000030: 00 e8 28 94 ff e0 83 f8 01 75 07 b8 ff ff 00 00
[ 3389.935852] JIT code: 00000040: eb 02 31 c0 c9 c3
When CONFIG_BPF_JIT_ALWAYS_ON is enabled, bpf_jit_enable is permanently set to 1 and
setting any other value than that will return in failure. This is even the case for
setting bpf_jit_enable to 2, since dumping the final JIT image into the kernel log
is discouraged and introspection through bpftool (under tools/bpf/bpftool/) is the
generally recommended approach instead.
In the kernel source tree under tools/bpf/, there’s bpf_jit_disasm for
generating disassembly out of the kernel log’s hexdump:
./bpf_jit_disasm
70 bytes emitted from JIT compiler (pass:3, flen:6)
ffffffffa0069c8f +
0: push %rbp
1: mov %rsp,%rbp
4: sub $0x60,%rsp
8: mov %rbx,-0x8(%rbp)
c: mov 0x68(%rdi),%r9d
10: sub 0x6c(%rdi),%r9d
14: mov 0xd8(%rdi),%r8
1b: mov $0xc,%esi
20: callq 0xffffffffe0ff9442
25: cmp $0x800,%eax
2a: jne 0x0000000000000042
2c: mov $0x17,%esi
31: callq 0xffffffffe0ff945e
36: cmp $0x1,%eax
39: jne 0x0000000000000042
3b: mov $0xffff,%eax
40: jmp 0x0000000000000044
42: xor %eax,%eax
44: leaveq
45: retq
Issuing option -o will “annotate” opcodes to resulting assembler
instructions, which can be very useful for JIT developers:
./bpf_jit_disasm -o
70 bytes emitted from JIT compiler (pass:3, flen:6)
ffffffffa0069c8f +
0: push %rbp
55
1: mov %rsp,%rbp
48 89 e5
4: sub $0x60,%rsp
48 83 ec 60
8: mov %rbx,-0x8(%rbp)
48 89 5d f8
c: mov 0x68(%rdi),%r9d
44 8b 4f 68
10: sub 0x6c(%rdi),%r9d
44 2b 4f 6c
14: mov 0xd8(%rdi),%r8
4c 8b 87 d8 00 00 00
1b: mov $0xc,%esi
be 0c 00 00 00
20: callq 0xffffffffe0ff9442
e8 1d 94 ff e0
25: cmp $0x800,%eax
3d 00 08 00 00
2a: jne 0x0000000000000042
75 16
2c: mov $0x17,%esi
be 17 00 00 00
31: callq 0xffffffffe0ff945e
e8 28 94 ff e0
36: cmp $0x1,%eax
83 f8 01
39: jne 0x0000000000000042
75 07
3b: mov $0xffff,%eax
b8 ff ff 00 00
40: jmp 0x0000000000000044
eb 02
42: xor %eax,%eax
31 c0
44: leaveq
c9
45: retq
c3
For BPF JIT developers, bpf_jit_disasm, bpf_asm and bpf_dbg provides a useful
toolchain for developing and testing the kernel’s JIT compiler.
BPF kernel internals
Internally, for the kernel interpreter, a different instruction set
format with similar underlying principles from BPF described in previous
paragraphs is being used. However, the instruction set format is modelled
closer to the underlying architecture to mimic native instruction sets, so
that a better performance can be achieved (more details later). This new
ISA is called ‘eBPF’ or ‘internal BPF’ interchangeably. (Note: eBPF which
originates from [e]xtended BPF is not the same as BPF extensions! While
eBPF is an ISA, BPF extensions date back to classic BPF’s ‘overloading’
of BPF_LD | BPF_{B,H,W} | BPF_ABS instruction.)
It is designed to be JITed with one to one mapping, which can also open up
the possibility for GCC/LLVM compilers to generate optimized eBPF code through
an eBPF backend that performs almost as fast as natively compiled code.
The new instruction set was originally designed with the possible goal in
mind to write programs in “restricted C” and compile into eBPF with a optional
GCC/LLVM backend, so that it can just-in-time map to modern 64-bit CPUs with
minimal performance overhead over two steps, that is, C -> eBPF -> native code.
Currently, the new format is being used for running user BPF programs, which
includes seccomp BPF, classic socket filters, cls_bpf traffic classifier,
team driver’s classifier for its load-balancing mode, netfilter’s xt_bpf
extension, PTP dissector/classifier, and much more. They are all internally
converted by the kernel into the new instruction set representation and run
in the eBPF interpreter. For in-kernel handlers, this all works transparently
by using bpf_prog_create() for setting up the filter, resp.
bpf_prog_destroy() for destroying it. The macro
BPF_PROG_RUN(filter, ctx) transparently invokes eBPF interpreter or JITed
code to run the filter. ‘filter’ is a pointer to struct bpf_prog that we
got from bpf_prog_create(), and ‘ctx’ the given context (e.g.
skb pointer). All constraints and restrictions from bpf_check_classic() apply
before a conversion to the new layout is being done behind the scenes!
Currently, the classic BPF format is being used for JITing on most 32-bit
architectures, whereas x86-64, aarch64, s390x, powerpc64, sparc64, arm32 perform
JIT compilation from eBPF instruction set.
Some core changes of the new internal format:
Number of registers increase from 2 to 10:
The old format had two registers A and X, and a hidden frame pointer. The
new layout extends this to be 10 internal registers and a read-only frame
pointer. Since 64-bit CPUs are passing arguments to functions via registers
the number of args from eBPF program to in-kernel function is restricted
to 5 and one register is used to accept return value from an in-kernel
function. Natively, x86_64 passes first 6 arguments in registers, aarch64/
sparcv9/mips64 have 7 - 8 registers for arguments; x86_64 has 6 callee saved
registers, and aarch64/sparcv9/mips64 have 11 or more callee saved registers.Therefore, eBPF calling convention is defined as:
- R0 - return value from in-kernel function, and exit value for eBPF program
- R1 - R5 - arguments from eBPF program to in-kernel function
- R6 - R9 - callee saved registers that in-kernel function will preserve
- R10 - read-only frame pointer to access stack
Thus, all eBPF registers map one to one to HW registers on x86_64, aarch64,
etc, and eBPF calling convention maps directly to ABIs used by the kernel on
64-bit architectures.On 32-bit architectures JIT may map programs that use only 32-bit arithmetic
and may let more complex programs to be interpreted.R0 - R5 are scratch registers and eBPF program needs spill/fill them if
necessary across calls. Note that there is only one eBPF program (== one
eBPF main routine) and it cannot call other eBPF functions, it can only
call predefined in-kernel functions, though.Register width increases from 32-bit to 64-bit:
Still, the semantics of the original 32-bit ALU operations are preserved
via 32-bit subregisters. All eBPF registers are 64-bit with 32-bit lower
subregisters that zero-extend into 64-bit if they are being written to.
That behavior maps directly to x86_64 and arm64 subregister definition, but
makes other JITs more difficult.32-bit architectures run 64-bit internal BPF programs via interpreter.
Their JITs may convert BPF programs that only use 32-bit subregisters into
native instruction set and let the rest being interpreted.Operation is 64-bit, because on 64-bit architectures, pointers are also
64-bit wide, and we want to pass 64-bit values in/out of kernel functions,
so 32-bit eBPF registers would otherwise require to define register-pair
ABI, thus, there won’t be able to use a direct eBPF register to HW register
mapping and JIT would need to do combine/split/move operations for every
register in and out of the function, which is complex, bug prone and slow.
Another reason is the use of atomic 64-bit counters.Conditional jt/jf targets replaced with jt/fall-through:
While the original design has constructs such as “if (cond) jump_true;
else jump_false;”, they are being replaced into alternative constructs like
“if (cond) jump_true; /* else fall-through */“.Introduces bpf_call insn and register passing convention for zero overhead
calls from/to other kernel functions:Before an in-kernel function call, the internal BPF program needs to
place function arguments into R1 to R5 registers to satisfy calling
convention, then the interpreter will take them from registers and pass
to in-kernel function. If R1 - R5 registers are mapped to CPU registers
that are used for argument passing on given architecture, the JIT compiler
doesn’t need to emit extra moves. Function arguments will be in the correct
registers and BPF_CALL instruction will be JITed as single ‘call’ HW
instruction. This calling convention was picked to cover common call
situations without performance penalty.After an in-kernel function call, R1 - R5 are reset to unreadable and R0 has
a return value of the function. Since R6 - R9 are callee saved, their state
is preserved across the call.For example, consider three C functions:
u64 f1() { return (*_f2)(1); }
u64 f2(u64 a) { return f3(a + 1, a); }
u64 f3(u64 a, u64 b) { return a - b; }GCC can compile f1, f3 into x86_64:
f1:
movl $1, %edi
movq _f2(%rip), %rax
jmp *%rax
f3:
movq %rdi, %rax
subq %rsi, %rax
retFunction f2 in eBPF may look like:
f2:
bpf_mov R2, R1
bpf_add R1, 1
bpf_call f3
bpf_exitIf f2 is JITed and the pointer stored to ‘_f2’. The calls f1 -> f2 -> f3 and
returns will be seamless. Without JIT, __bpf_prog_run() interpreter needs to
be used to call into f2.For practical reasons all eBPF programs have only one argument ‘ctx’ which is
already placed into R1 (e.g. on __bpf_prog_run() startup) and the programs
can call kernel functions with up to 5 arguments. Calls with 6 or more arguments
are currently not supported, but these restrictions can be lifted if necessary
in the future.On 64-bit architectures all register map to HW registers one to one. For
example, x86_64 JIT compiler can map them as …R0 - rax
R1 - rdi
R2 - rsi
R3 - rdx
R4 - rcx
R5 - r8
R6 - rbx
R7 - r13
R8 - r14
R9 - r15
R10 - rbp… since x86_64 ABI mandates rdi, rsi, rdx, rcx, r8, r9 for argument passing
and rbx, r12 - r15 are callee saved.Then the following internal BPF pseudo-program:
bpf_mov R6, R1 /* save ctx /
bpf_mov R2, 2
bpf_mov R3, 3
bpf_mov R4, 4
bpf_mov R5, 5
bpf_call foo
bpf_mov R7, R0 / save foo() return value /
bpf_mov R1, R6 / restore ctx for next call */
bpf_mov R2, 6
bpf_mov R3, 7
bpf_mov R4, 8
bpf_mov R5, 9
bpf_call bar
bpf_add R0, R7
bpf_exitAfter JIT to x86_64 may look like:
push %rbp
mov %rsp,%rbp
sub $0x228,%rsp
mov %rbx,-0x228(%rbp)
mov %r13,-0x220(%rbp)
mov %rdi,%rbx
mov $0x2,%esi
mov $0x3,%edx
mov $0x4,%ecx
mov $0x5,%r8d
callq foo
mov %rax,%r13
mov %rbx,%rdi
mov $0x2,%esi
mov $0x3,%edx
mov $0x4,%ecx
mov $0x5,%r8d
callq bar
add %r13,%rax
mov -0x228(%rbp),%rbx
mov -0x220(%rbp),%r13
leaveq
retqWhich is in this example equivalent in C to:
u64 bpf_filter(u64 ctx)
{return foo(ctx, 2, 3, 4, 5) + bar(ctx, 6, 7, 8, 9);}
In-kernel functions foo() and bar() with prototype: u64 (*)(u64 arg1, u64
arg2, u64 arg3, u64 arg4, u64 arg5); will receive arguments in proper
registers and place their return value into ‘%rax’ which is R0 in eBPF.
Prologue and epilogue are emitted by JIT and are implicit in the
interpreter. R0-R5 are scratch registers, so eBPF program needs to preserve
them across the calls as defined by calling convention.For example the following program is invalid:
bpf_mov R1, 1
bpf_call foo
bpf_mov R0, R1
bpf_exitAfter the call the registers R1-R5 contain junk values and cannot be read.
An in-kernel eBPF verifier is used to validate internal BPF programs.
Also in the new design, eBPF is limited to 4096 insns, which means that any
program will terminate quickly and will only call a fixed number of kernel
functions. Original BPF and the new format are two operand instructions,
which helps to do one-to-one mapping between eBPF insn and x86 insn during JIT.
The input context pointer for invoking the interpreter function is generic,
its content is defined by a specific use case. For seccomp register R1 points
to seccomp_data, for converted BPF filters R1 points to a skb.
A program, that is translated internally consists of the following elements:
op:16, jt:8, jf:8, k:32 ==> op:8, dst_reg:4, src_reg:4, off:16, imm:32
So far 87 internal BPF instructions were implemented. 8-bit ‘op’ opcode field
has room for new instructions. Some of them may use 16/24/32 byte encoding. New
instructions must be multiple of 8 bytes to preserve backward compatibility.
Internal BPF is a general purpose RISC instruction set. Not every register and
every instruction are used during translation from original BPF to new format.
For example, socket filters are not using ‘exclusive add’ instruction, but
tracing filters may do to maintain counters of events, for example. Register R9
is not used by socket filters either, but more complex filters may be running
out of registers and would have to resort to spill/fill to stack.
Internal BPF can used as generic assembler for last step performance
optimizations, socket filters and seccomp are using it as assembler. Tracing
filters may use it as assembler to generate code from kernel. In kernel usage
may not be bounded by security considerations, since generated internal BPF code
may be optimizing internal code path and not being exposed to the user space.
Safety of internal BPF can come from a verifier (TBD). In such use cases as
described, it may be used as safe instruction set.
Just like the original BPF, the new format runs within a controlled environment,
is deterministic and the kernel can easily prove that. The safety of the program
can be determined in two steps: first step does depth-first-search to disallow
loops and other CFG validation; second step starts from the first insn and
descends all possible paths. It simulates execution of every insn and observes
the state change of registers and stack.
eBPF opcode encoding
eBPF is reusing most of the opcode encoding from classic to simplify conversion
of classic BPF to eBPF. For arithmetic and jump instructions the 8-bit ‘code’
field is divided into three parts:
+—————-+——–+——————–+
| 4 bits | 1 bit | 3 bits |
| operation code | source | instruction class |
+—————-+——–+——————–+
(MSB) (LSB)
Three LSB bits store instruction class which is one of:
Classic BPF classes: eBPF classes:
BPF_LD 0x00 BPF_LD 0x00
BPF_LDX 0x01 BPF_LDX 0x01
BPF_ST 0x02 BPF_ST 0x02
BPF_STX 0x03 BPF_STX 0x03
BPF_ALU 0x04 BPF_ALU 0x04
BPF_JMP 0x05 BPF_JMP 0x05
BPF_RET 0x06 [ class 6 unused, for future if needed ]
BPF_MISC 0x07 BPF_ALU64 0x07
When BPF_CLASS(code) == BPF_ALU or BPF_JMP, 4th bit encodes source operand …
BPF_K 0x00
BPF_X 0x08
in classic BPF, this means:
BPF_SRC(code) == BPF_X - use register X as source operand
BPF_SRC(code) == BPF_K - use 32-bit immediate as source operandin eBPF, this means:
BPF_SRC(code) == BPF_X - use ‘src_reg’ register as source operand
BPF_SRC(code) == BPF_K - use 32-bit immediate as source operand
… and four MSB bits store operation code.
If BPF_CLASS(code) == BPF_ALU or BPF_ALU64 [ in eBPF ], BPF_OP(code) is one of:
BPF_ADD 0x00
BPF_SUB 0x10
BPF_MUL 0x20
BPF_DIV 0x30
BPF_OR 0x40
BPF_AND 0x50
BPF_LSH 0x60
BPF_RSH 0x70
BPF_NEG 0x80
BPF_MOD 0x90
BPF_XOR 0xa0
BPF_MOV 0xb0 /* eBPF only: mov reg to reg /
BPF_ARSH 0xc0 / eBPF only: sign extending shift right /
BPF_END 0xd0 / eBPF only: endianness conversion */
If BPF_CLASS(code) == BPF_JMP, BPF_OP(code) is one of:
BPF_JA 0x00
BPF_JEQ 0x10
BPF_JGT 0x20
BPF_JGE 0x30
BPF_JSET 0x40
BPF_JNE 0x50 /* eBPF only: jump != /
BPF_JSGT 0x60 / eBPF only: signed ‘>’ /
BPF_JSGE 0x70 / eBPF only: signed ‘>=’ /
BPF_CALL 0x80 / eBPF only: function call /
BPF_EXIT 0x90 / eBPF only: function return /
BPF_JLT 0xa0 / eBPF only: unsigned ‘<’ /
BPF_JLE 0xb0 / eBPF only: unsigned ‘<=’ /
BPF_JSLT 0xc0 / eBPF only: signed ‘<’ /
BPF_JSLE 0xd0 / eBPF only: signed ‘<=’ */
So BPF_ADD | BPF_X | BPF_ALU means 32-bit addition in both classic BPF
and eBPF. There are only two registers in classic BPF, so it means A += X.
In eBPF it means dst_reg = (u32) dst_reg + (u32) src_reg; similarly,
BPF_XOR | BPF_K | BPF_ALU means A ^= imm32 in classic BPF and analogous
src_reg = (u32) src_reg ^ (u32) imm32 in eBPF.
Classic BPF is using BPF_MISC class to represent A = X and X = A moves.
eBPF is using BPF_MOV | BPF_X | BPF_ALU code instead. Since there are no
BPF_MISC operations in eBPF, the class 7 is used as BPF_ALU64 to mean
exactly the same operations as BPF_ALU, but with 64-bit wide operands
instead. So BPF_ADD | BPF_X | BPF_ALU64 means 64-bit addition, i.e.:
dst_reg = dst_reg + src_reg
Classic BPF wastes the whole BPF_RET class to represent a single ‘ret’
operation. Classic BPF_RET | BPF_K means copy imm32 into return register
and perform function exit. eBPF is modeled to match CPU, so BPF_JMP | BPF_EXIT
in eBPF means function exit only. The eBPF program needs to store return
value into register R0 before doing a BPF_EXIT. Class 6 in eBPF is currently
unused and reserved for future use.
For load and store instructions the 8-bit ‘code’ field is divided as:
+——–+——–+——————-+
| 3 bits | 2 bits | 3 bits |
| mode | size | instruction class |
+——–+——–+——————-+
(MSB) (LSB)
Size modifier is one of …
BPF_W 0x00 /* word /
BPF_H 0x08 / half word /
BPF_B 0x10 / byte /
BPF_DW 0x18 / eBPF only, double word */
… which encodes size of load/store operation:
B - 1 byte
H - 2 byte
W - 4 byte
DW - 8 byte (eBPF only)
Mode modifier is one of:
BPF_IMM 0x00 /* used for 32-bit mov in classic BPF and 64-bit in eBPF /
BPF_ABS 0x20
BPF_IND 0x40
BPF_MEM 0x60
BPF_LEN 0x80 / classic BPF only, reserved in eBPF /
BPF_MSH 0xa0 / classic BPF only, reserved in eBPF /
BPF_XADD 0xc0 / eBPF only, exclusive add */
eBPF has two non-generic instructions: (BPF_ABS |
(BPF_IND |
They had to be carried over from classic to have strong performance of
socket filters running in eBPF interpreter. These instructions can only
be used when interpreter context is a pointer to ‘struct sk_buff’ and
have seven implicit operands. Register R6 is an implicit input that must
contain pointer to sk_buff. Register R0 is an implicit output which contains
the data fetched from the packet. Registers R1-R5 are scratch registers
and must not be used to store the data across BPF_ABS | BPF_LD or
BPF_IND | BPF_LD instructions.
These instructions have implicit program exit condition as well. When
eBPF program is trying to access the data beyond the packet boundary,
the interpreter will abort the execution of the program. JIT compilers
therefore must preserve this property. src_reg and imm32 fields are
explicit inputs to these instructions.
For example:
BPF_IND | BPF_W | BPF_LD means:
R0 = ntohl(*(u32 *) (((struct sk_buff *) R6)->data + src_reg + imm32))
and R1 - R5 were scratched.
Unlike classic BPF instruction set, eBPF has generic load/store operations:
BPF_MEM |
BPF_MEM |
BPF_MEM |
BPF_XADD | BPF_W | BPF_STX: lock xadd *(u32 *)(dst_reg + off16) += src_reg
BPF_XADD | BPF_DW | BPF_STX: lock xadd *(u64 *)(dst_reg + off16) += src_reg
Where size is one of: BPF_B or BPF_H or BPF_W or BPF_DW. Note that 1 and
2 byte atomic increments are not supported.
eBPF has one 16-byte instruction: BPF_LD | BPF_DW | BPF_IMM which consists
of two consecutive ‘struct bpf_insn’ 8-byte blocks and interpreted as single
instruction that loads 64-bit immediate value into a dst_reg.
Classic BPF has similar instruction: BPF_LD | BPF_W | BPF_IMM which loads
32-bit immediate value into a register.
eBPF verifier
The safety of the eBPF program is determined in two steps.
First step does DAG check to disallow loops and other CFG validation.
In particular it will detect programs that have unreachable instructions.
(though classic BPF checker allows them)
Second step starts from the first insn and descends all possible paths.
It simulates execution of every insn and observes the state change of
registers and stack.
At the start of the program the register R1 contains a pointer to context
and has type PTR_TO_CTX.
If verifier sees an insn that does R2=R1, then R2 has now type
PTR_TO_CTX as well and can be used on the right hand side of expression.
If R1=PTR_TO_CTX and insn is R2=R1+R1, then R2=SCALAR_VALUE,
since addition of two valid pointers makes invalid pointer.
(In ‘secure’ mode verifier will reject any type of pointer arithmetic to make
sure that kernel addresses don’t leak to unprivileged users)
If register was never written to, it’s not readable:
bpf_mov R0 = R2
bpf_exit
will be rejected, since R2 is unreadable at the start of the program.
After kernel function call, R1-R5 are reset to unreadable and
R0 has a return type of the function.
Since R6-R9 are callee saved, their state is preserved across the call.
bpf_mov R6 = 1
bpf_call foo
bpf_mov R0 = R6
bpf_exit
is a correct program. If there was R1 instead of R6, it would have
been rejected.
load/store instructions are allowed only with registers of valid types, which
are PTR_TO_CTX, PTR_TO_MAP, PTR_TO_STACK. They are bounds and alignment checked.
For example:
bpf_mov R1 = 1
bpf_mov R2 = 2
bpf_xadd *(u32 *)(R1 + 3) += R2
bpf_exit
will be rejected, since R1 doesn’t have a valid pointer type at the time of
execution of instruction bpf_xadd.
At the start R1 type is PTR_TO_CTX (a pointer to generic ‘struct bpf_context’)
A callback is used to customize verifier to restrict eBPF program access to only
certain fields within ctx structure with specified size and alignment.
For example, the following insn:
bpf_ld R0 = *(u32 *)(R6 + 8)
intends to load a word from address R6 + 8 and store it into R0
If R6=PTR_TO_CTX, via is_valid_access() callback the verifier will know
that offset 8 of size 4 bytes can be accessed for reading, otherwise
the verifier will reject the program.
If R6=PTR_TO_STACK, then access should be aligned and be within
stack bounds, which are [-MAX_BPF_STACK, 0). In this example offset is 8,
so it will fail verification, since it’s out of bounds.
The verifier will allow eBPF program to read data from stack only after
it wrote into it.
Classic BPF verifier does similar check with M[0-15] memory slots.
For example:
bpf_ld R0 = *(u32 *)(R10 - 4)
bpf_exit
is invalid program.
Though R10 is correct read-only register and has type PTR_TO_STACK
and R10 - 4 is within stack bounds, there were no stores into that location.
Pointer register spill/fill is tracked as well, since four (R6-R9)
callee saved registers may not be enough for some programs.
Allowed function calls are customized with bpf_verifier_ops->get_func_proto()
The eBPF verifier will check that registers match argument constraints.
After the call register R0 will be set to return type of the function.
Function calls is a main mechanism to extend functionality of eBPF programs.
Socket filters may let programs to call one set of functions, whereas tracing
filters may allow completely different set.
If a function made accessible to eBPF program, it needs to be thought through
from safety point of view. The verifier will guarantee that the function is
called with valid arguments.
seccomp vs socket filters have different security restrictions for classic BPF.
Seccomp solves this by two stage verifier: classic BPF verifier is followed
by seccomp verifier. In case of eBPF one configurable verifier is shared for
all use cases.
See details of eBPF verifier in kernel/bpf/verifier.c
Register value tracking
In order to determine the safety of an eBPF program, the verifier must track
the range of possible values in each register and also in each stack slot.
This is done with ‘struct bpf_reg_state’, defined in include/linux/
bpf_verifier.h, which unifies tracking of scalar and pointer values. Each
register state has a type, which is either NOT_INIT (the register has not been
written to), SCALAR_VALUE (some value which is not usable as a pointer), or a
pointer type. The types of pointers describe their base, as follows:
PTR_TO_CTX Pointer to bpf_context.
CONST_PTR_TO_MAP Pointer to struct bpf_map. “Const” because arithmetic
on these pointers is forbidden.
PTR_TO_MAP_VALUE Pointer to the value stored in a map element.
PTR_TO_MAP_VALUE_OR_NULL
Either a pointer to a map value, or NULL; map accesses
(see section ‘eBPF maps’, below) return this type,
which becomes a PTR_TO_MAP_VALUE when checked != NULL.
Arithmetic on these pointers is forbidden.
PTR_TO_STACK Frame pointer.
PTR_TO_PACKET skb->data.
PTR_TO_PACKET_END skb->data + headlen; arithmetic forbidden.
However, a pointer may be offset from this base (as a result of pointer
arithmetic), and this is tracked in two parts: the ‘fixed offset’ and ‘variable
offset’. The former is used when an exactly-known value (e.g. an immediate
operand) is added to a pointer, while the latter is used for values which are
not exactly known. The variable offset is also used in SCALAR_VALUEs, to track
the range of possible values in the register.
The verifier’s knowledge about the variable offset consists of:
- minimum and maximum values as unsigned
- minimum and maximum values as signed
- knowledge of the values of individual bits, in the form of a ‘tnum’: a u64
‘mask’ and a u64 ‘value’. 1s in the mask represent bits whose value is unknown;
1s in the value represent bits known to be 1. Bits known to be 0 have 0 in both
mask and value; no bit should ever be 1 in both. For example, if a byte is read
into a register from memory, the register’s top 56 bits are known zero, while
the low 8 are unknown - which is represented as the tnum (0x0; 0xff). If we
then OR this with 0x40, we get (0x40; 0xbf), then if we add 1 we get (0x0;
0x1ff), because of potential carries.
Besides arithmetic, the register state can also be updated by conditional
branches. For instance, if a SCALAR_VALUE is compared > 8, in the ‘true’ branch
it will have a umin_value (unsigned minimum value) of 9, whereas in the ‘false’
branch it will have a umax_value of 8. A signed compare (with BPF_JSGT or
BPF_JSGE) would instead update the signed minimum/maximum values. Information
from the signed and unsigned bounds can be combined; for instance if a value is
first tested < 8 and then tested s> 4, the verifier will conclude that the value
is also > 4 and s< 8, since the bounds prevent crossing the sign boundary.
PTR_TO_PACKETs with a variable offset part have an ‘id’, which is common to all
pointers sharing that same variable offset. This is important for packet range
checks: after adding a variable to a packet pointer register A, if you then copy
it to another register B and then add a constant 4 to A, both registers will
share the same ‘id’ but the A will have a fixed offset of +4. Then if A is
bounds-checked and found to be less than a PTR_TO_PACKET_END, the register B is
now known to have a safe range of at least 4 bytes. See ‘Direct packet access’,
below, for more on PTR_TO_PACKET ranges.
The ‘id’ field is also used on PTR_TO_MAP_VALUE_OR_NULL, common to all copies of
the pointer returned from a map lookup. This means that when one copy is
checked and found to be non-NULL, all copies can become PTR_TO_MAP_VALUEs.
As well as range-checking, the tracked information is also used for enforcing
alignment of pointer accesses. For instance, on most systems the packet pointer
is 2 bytes after a 4-byte alignment. If a program adds 14 bytes to that to jump
over the Ethernet header, then reads IHL and addes (IHL * 4), the resulting
pointer will have a variable offset known to be 4n+2 for some n, so adding the 2
bytes (NET_IP_ALIGN) gives a 4-byte alignment and so word-sized accesses through
that pointer are safe.
Direct packet access
In cls_bpf and act_bpf programs the verifier allows direct access to the packet
data via skb->data and skb->data_end pointers.
Ex:
1: r4 = *(u32 )(r1 +80) / load skb->data_end /
2: r3 = *(u32 *)(r1 +76) / load skb->data /
3: r5 = r3
4: r5 += 14
5: if r5 > r4 goto pc+16
R1=ctx R3=pkt(id=0,off=0,r=14) R4=pkt_end R5=pkt(id=0,off=14,r=14) R10=fp
6: r0 = *(u16 *)(r3 +12) / access 12 and 13 bytes of the packet */
this 2byte load from the packet is safe to do, since the program author
did check ‘if (skb->data + 14 > skb->data_end) goto err’ at insn #5 which
means that in the fall-through case the register R3 (which points to skb->data)
has at least 14 directly accessible bytes. The verifier marks it
as R3=pkt(id=0,off=0,r=14).
id=0 means that no additional variables were added to the register.
off=0 means that no additional constants were added.
r=14 is the range of safe access which means that bytes [R3, R3 + 14) are ok.
Note that R5 is marked as R5=pkt(id=0,off=14,r=14). It also points
to the packet data, but constant 14 was added to the register, so
it now points to ‘skb->data + 14’ and accessible range is [R5, R5 + 14 - 14)
which is zero bytes.
More complex packet access may look like:
R0=inv1 R1=ctx R3=pkt(id=0,off=0,r=14) R4=pkt_end R5=pkt(id=0,off=14,r=14) R10=fp
6: r0 = (u8 )(r3 +7) / load 7th byte from the packet */
7: r4 = *(u8 *)(r3 +12)
8: r4 *= 14
9: r3 = *(u32 *)(r1 +76) / load skb->data /
10: r3 += r4
11: r2 = r1
12: r2 <<= 48
13: r2 >>= 48
14: r3 += r2
15: r2 = r3
16: r2 += 8
17: r1 = *(u32 *)(r1 +80) / load skb->data_end */
18: if r2 > r1 goto pc+2
R0=inv(id=0,umax_value=255,var_off=(0x0; 0xff)) R1=pkt_end R2=pkt(id=2,off=8,r=8) R3=pkt(id=2,off=0,r=8) R4=inv(id=0,umax_value=3570,var_off=(0x0; 0xfffe)) R5=pkt(id=0,off=14,r=14) R10=fp
19: r1 = *(u8 *)(r3 +4)
The state of the register R3 is R3=pkt(id=2,off=0,r=8)
id=2 means that two ‘r3 += rX’ instructions were seen, so r3 points to some
offset within a packet and since the program author did
‘if (r3 + 8 > r1) goto err’ at insn #18, the safe range is [R3, R3 + 8).
The verifier only allows ‘add’/‘sub’ operations on packet registers. Any other
operation will set the register state to ‘SCALAR_VALUE’ and it won’t be
available for direct packet access.
Operation ‘r3 += rX’ may overflow and become less than original skb->data,
therefore the verifier has to prevent that. So when it sees ‘r3 += rX’
instruction and rX is more than 16-bit value, any subsequent bounds-check of r3
against skb->data_end will not give us ‘range’ information, so attempts to read
through the pointer will give “invalid access to packet” error.
Ex. after insn ‘r4 = *(u8 *)(r3 +12)’ (insn #7 above) the state of r4 is
R4=inv(id=0,umax_value=255,var_off=(0x0; 0xff)) which means that upper 56 bits
of the register are guaranteed to be zero, and nothing is known about the lower
8 bits. After insn ‘r4 *= 14’ the state becomes
R4=inv(id=0,umax_value=3570,var_off=(0x0; 0xfffe)), since multiplying an 8-bit
value by constant 14 will keep upper 52 bits as zero, also the least significant
bit will be zero as 14 is even. Similarly ‘r2 >>= 48’ will make
R2=inv(id=0,umax_value=65535,var_off=(0x0; 0xffff)), since the shift is not sign
extending. This logic is implemented in adjust_reg_min_max_vals() function,
which calls adjust_ptr_min_max_vals() for adding pointer to scalar (or vice
versa) and adjust_scalar_min_max_vals() for operations on two scalars.
The end result is that bpf program author can access packet directly
using normal C code as:
void *data = (void *)(long)skb->data;
void *data_end = (void *)(long)skb->data_end;
struct eth_hdr *eth = data;
struct iphdr *iph = data + sizeof(*eth);
struct udphdr *udp = data + sizeof(*eth) + sizeof(*iph);
if (data + sizeof(*eth) + sizeof(*iph) + sizeof(*udp) > data_end)
return 0;
if (eth->h_proto != htons(ETH_P_IP))
return 0;
if (iph->protocol != IPPROTO_UDP || iph->ihl != 5)
return 0;
if (udp->dest == 53 || udp->source == 9)
…;
which makes such programs easier to write comparing to LD_ABS insn
and significantly faster.
eBPF maps
‘maps’ is a generic storage of different types for sharing data between kernel
and userspace.
The maps are accessed from user space via BPF syscall, which has commands:
create a map with given type and attributes
map_fd = bpf(BPF_MAP_CREATE, union bpf_attr *attr, u32 size)
using attr->map_type, attr->key_size, attr->value_size, attr->max_entries
returns process-local file descriptor or negative errorlookup key in a given map
err = bpf(BPF_MAP_LOOKUP_ELEM, union bpf_attr *attr, u32 size)
using attr->map_fd, attr->key, attr->value
returns zero and stores found elem into value or negative errorcreate or update key/value pair in a given map
err = bpf(BPF_MAP_UPDATE_ELEM, union bpf_attr *attr, u32 size)
using attr->map_fd, attr->key, attr->value
returns zero or negative errorfind and delete element by key in a given map
err = bpf(BPF_MAP_DELETE_ELEM, union bpf_attr *attr, u32 size)
using attr->map_fd, attr->keyto delete map: close(fd)
Exiting process will delete maps automatically
userspace programs use this syscall to create/access maps that eBPF programs
are concurrently updating.
maps can have different types: hash, array, bloom filter, radix-tree, etc.
The map is defined by:
. type
. max number of elements
. key size in bytes
. value size in bytes
Pruning
The verifier does not actually walk all possible paths through the program. For
each new branch to analyse, the verifier looks at all the states it’s previously
been in when at this instruction. If any of them contain the current state as a
subset, the branch is ‘pruned’ - that is, the fact that the previous state was
accepted implies the current state would be as well. For instance, if in the
previous state, r1 held a packet-pointer, and in the current state, r1 holds a
packet-pointer with a range as long or longer and at least as strict an
alignment, then r1 is safe. Similarly, if r2 was NOT_INIT before then it can’t
have been used by any path from that point, so any value in r2 (including
another NOT_INIT) is safe. The implementation is in the function regsafe().
Pruning considers not only the registers but also the stack (and any spilled
registers it may hold). They must all be safe for the branch to be pruned.
This is implemented in states_equal().
Understanding eBPF verifier messages
The following are few examples of invalid eBPF programs and verifier error
messages as seen in the log:
Program with unreachable instructions:
static struct bpf_insn prog[] = {
BPF_EXIT_INSN(),
BPF_EXIT_INSN(),
};
Error:
unreachable insn 1
Program that reads uninitialized register:
BPF_MOV64_REG(BPF_REG_0, BPF_REG_2),
BPF_EXIT_INSN(),
Error:
0: (bf) r0 = r2
R2 !read_ok
Program that doesn’t initialize R0 before exiting:
BPF_MOV64_REG(BPF_REG_2, BPF_REG_1),
BPF_EXIT_INSN(),
Error:
0: (bf) r2 = r1
1: (95) exit
R0 !read_ok
Program that accesses stack out of bounds:
BPF_ST_MEM(BPF_DW, BPF_REG_10, 8, 0),
BPF_EXIT_INSN(),
Error:
0: (7a) *(u64 *)(r10 +8) = 0
invalid stack off=8 size=8
Program that doesn’t initialize stack before passing its address into function:
BPF_MOV64_REG(BPF_REG_2, BPF_REG_10),
BPF_ALU64_IMM(BPF_ADD, BPF_REG_2, -8),
BPF_LD_MAP_FD(BPF_REG_1, 0),
BPF_RAW_INSN(BPF_JMP | BPF_CALL, 0, 0, 0, BPF_FUNC_map_lookup_elem),
BPF_EXIT_INSN(),
Error:
0: (bf) r2 = r10
1: (07) r2 += -8
2: (b7) r1 = 0x0
3: (85) call 1
invalid indirect read from stack off -8+0 size 8
Program that uses invalid map_fd=0 while calling to map_lookup_elem() function:
BPF_ST_MEM(BPF_DW, BPF_REG_10, -8, 0),
BPF_MOV64_REG(BPF_REG_2, BPF_REG_10),
BPF_ALU64_IMM(BPF_ADD, BPF_REG_2, -8),
BPF_LD_MAP_FD(BPF_REG_1, 0),
BPF_RAW_INSN(BPF_JMP | BPF_CALL, 0, 0, 0, BPF_FUNC_map_lookup_elem),
BPF_EXIT_INSN(),
Error:
0: (7a) *(u64 *)(r10 -8) = 0
1: (bf) r2 = r10
2: (07) r2 += -8
3: (b7) r1 = 0x0
4: (85) call 1
fd 0 is not pointing to valid bpf_map
Program that doesn’t check return value of map_lookup_elem() before accessing
map element:
BPF_ST_MEM(BPF_DW, BPF_REG_10, -8, 0),
BPF_MOV64_REG(BPF_REG_2, BPF_REG_10),
BPF_ALU64_IMM(BPF_ADD, BPF_REG_2, -8),
BPF_LD_MAP_FD(BPF_REG_1, 0),
BPF_RAW_INSN(BPF_JMP | BPF_CALL, 0, 0, 0, BPF_FUNC_map_lookup_elem),
BPF_ST_MEM(BPF_DW, BPF_REG_0, 0, 0),
BPF_EXIT_INSN(),
Error:
0: (7a) *(u64 *)(r10 -8) = 0
1: (bf) r2 = r10
2: (07) r2 += -8
3: (b7) r1 = 0x0
4: (85) call 1
5: (7a) *(u64 *)(r0 +0) = 0
R0 invalid mem access ‘map_value_or_null’
Program that correctly checks map_lookup_elem() returned value for NULL, but
accesses the memory with incorrect alignment:
BPF_ST_MEM(BPF_DW, BPF_REG_10, -8, 0),
BPF_MOV64_REG(BPF_REG_2, BPF_REG_10),
BPF_ALU64_IMM(BPF_ADD, BPF_REG_2, -8),
BPF_LD_MAP_FD(BPF_REG_1, 0),
BPF_RAW_INSN(BPF_JMP | BPF_CALL, 0, 0, 0, BPF_FUNC_map_lookup_elem),
BPF_JMP_IMM(BPF_JEQ, BPF_REG_0, 0, 1),
BPF_ST_MEM(BPF_DW, BPF_REG_0, 4, 0),
BPF_EXIT_INSN(),
Error:
0: (7a) *(u64 *)(r10 -8) = 0
1: (bf) r2 = r10
2: (07) r2 += -8
3: (b7) r1 = 1
4: (85) call 1
5: (15) if r0 == 0x0 goto pc+1
R0=map_ptr R10=fp
6: (7a) *(u64 *)(r0 +4) = 0
misaligned access off 4 size 8
Program that correctly checks map_lookup_elem() returned value for NULL and
accesses memory with correct alignment in one side of ‘if’ branch, but fails
to do so in the other side of ‘if’ branch:
BPF_ST_MEM(BPF_DW, BPF_REG_10, -8, 0),
BPF_MOV64_REG(BPF_REG_2, BPF_REG_10),
BPF_ALU64_IMM(BPF_ADD, BPF_REG_2, -8),
BPF_LD_MAP_FD(BPF_REG_1, 0),
BPF_RAW_INSN(BPF_JMP | BPF_CALL, 0, 0, 0, BPF_FUNC_map_lookup_elem),
BPF_JMP_IMM(BPF_JEQ, BPF_REG_0, 0, 2),
BPF_ST_MEM(BPF_DW, BPF_REG_0, 0, 0),
BPF_EXIT_INSN(),
BPF_ST_MEM(BPF_DW, BPF_REG_0, 0, 1),
BPF_EXIT_INSN(),
Error:
0: (7a) *(u64 *)(r10 -8) = 0
1: (bf) r2 = r10
2: (07) r2 += -8
3: (b7) r1 = 1
4: (85) call 1
5: (15) if r0 == 0x0 goto pc+2
R0=map_ptr R10=fp
6: (7a) *(u64 *)(r0 +0) = 0
7: (95) exit
from 5 to 8: R0=imm0 R10=fp
8: (7a) *(u64 *)(r0 +0) = 1
R0 invalid mem access ‘imm’
Testing
Next to the BPF toolchain, the kernel also ships a test module that contains
various test cases for classic and internal BPF that can be executed against
the BPF interpreter and JIT compiler. It can be found in lib/test_bpf.c and
enabled via Kconfig:
CONFIG_TEST_BPF=m
After the module has been built and installed, the test suite can be executed
via insmod or modprobe against ‘test_bpf’ module. Results of the test cases
including timings in nsec can be found in the kernel log (dmesg).
Misc
Also trinity, the Linux syscall fuzzer, has built-in support for BPF and
SECCOMP-BPF kernel fuzzing.
Written by
The document was written in the hope that it is found useful and in order
to give potential BPF hackers or security auditors a better overview of
the underlying architecture.
Jay Schulist jschlst@samba.org
Daniel Borkmann daniel@iogearbox.net
Alexei Starovoitov ast@kernel.org
