| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| A flaw was found in rsyslog. An unauthenticated remote attacker can trigger a heap buffer overflow in the RainerScript `replace()` function by sending specially crafted syslog messages. This vulnerability arises from an incorrect buffer size calculation during string replacement, causing memory corruption. Successful exploitation can lead to a denial of service (DoS) for the affected system. |
| In the Linux kernel, the following vulnerability has been resolved:
USB: serial: safe_serial: fix memory corruption with small endpoint
Make sure that the bulk-out buffer size is at least eight bytes to avoid
user-controlled slab corruption in "safe" mode should a malicious device
report a smaller size. |
| In the Linux kernel, the following vulnerability has been resolved:
page_pool: keep frag_offset aligned for odd-sized requests
page_pool_alloc_frag_netmem() rounds the requested fragment size with
size = ALIGN(size, dma_get_cache_alignment());
dma_get_cache_alignment() returns 1 unless the architecture defines
ARCH_DMA_MINALIGN, which DMA-coherent architectures such as x86 do not.
There the ALIGN() is a no-op and pool->frag_offset advances by the raw,
unrounded size.
A single caller asking for an odd size then leaves frag_offset misaligned
for every fragment carved out of that page afterwards. The pool is shared,
so the damage is not confined to the caller that caused it.
The per-cpu system_page_pool used by generic XDP hits this.
skb_pp_cow_data() allocates its fragments with the raw packet length:
size = min_t(u32, len, PAGE_SIZE);
truesize = size;
page = page_pool_dev_alloc(pool, &page_off, &truesize);
leaving frag_offset odd for whatever is carved out of that page next. Its
own head allocation is already aligned -- SKB_HEAD_ALIGN(size) plus the
XDP_PACKET_HEADROOM its callers pass -- so it is a later user of the shared
pool that pays: page_pool_dev_alloc_va() returns a misaligned buffer,
napi_build_skb() installs it as skb->head, and skb_shinfo(skb) ==
skb->head + skb->end is misaligned with it.
skb_shinfo()->dataref is a 4-byte atomic_t at offset 0x20, so the
atomic_inc() in __skb_clone() straddles a cache line. On x86 with split
lock detection -- fatal for kernel split locks by default -- this panics
the machine:
Oops: Split lock detected
RIP: 0010:skb_clone+0x154/0x1e0
Call Trace:
<IRQ>
raw_local_deliver+0x1ed/0x2c0
ip_protocol_deliver_rcu+0x54/0x1c0
ip_local_deliver_finish+0x85/0x100
ip_local_deliver+0x67/0x100
__netif_receive_skb_one_core+0x85/0xa0
process_backlog+0x87/0x130
Reproduced by attaching any generic-mode XDP program to loopback and
opening a RAW IPPROTO_UDP socket, which makes raw_local_deliver() clone
every locally delivered UDP packet; ordinary DNS traffic then triggers it,
roughly once per 2500 clones. Observed on 6.12.101 and 7.1.8.
Tracing page_pool_alloc_frag_netmem() over one such run shows the
amplification -- two odd-sized requests, nine misaligned offsets:
requested size & 7: 0: 17035 5: 1 7: 1
frag_offset & 7: 0: 17028 3: 1 4: 1 5: 1 6: 1 7: 5
and skb_pp_cow_data() returning heads that were aligned on entry:
head 0xffff8f4c86aeac00 -> 0xffff8f4c53a9a9c4 (&7=4)
head 0xffff8f4d6a8a42c0 -> 0xffff8f4c4f7b7a45 (&7=5)
Round the fragment size up to at least the alignment struct skb_shared_info
requires, so fragments are always suitably aligned for the objects callers
build on them. Architectures needing a larger DMA alignment keep it.
This also makes the remainder computed in page_pool_alloc_netmem(),
*size = max_size - *offset;
aligned, since max_size is a power of two -- which fixes the matching
misalignment of skb->end.
Verified with a controlled A/B under QEMU/KVM: same tree, same config,
same compiler, same rootfs and identical traffic, differing only by this
patch. A SEC("xdp.frags") XDP_PASS program on lo plus UDP datagrams
larger than max_head_size drives skb_pp_cow_data()'s fragment loop, which
passes raw packet lengths to the pool. Measured at the return of
skb_pp_cow_data():
unpatched patched
skb_pp_cow_data calls 40800 40800
misaligned skb->head 1120 0
dataref at line offset >60 80 0
The last row counts the accesses that actually fault:
skb_shinfo()->dataref sits at head+end+0x20 and is a 4-byte atomic, so
`lock incl` splits a 64-byte cache line only when that address lands at
offset 61..63. All 80 occurrences were at offset 61; the panic reported
above was at offset 62. Eliminating the misalignment removes every one
of them.
Same class of bug as commit 3bed3cc4156e ("net: Do not allocate page
fragments t
---truncated--- |
| In the Linux kernel, the following vulnerability has been resolved:
s390/pci: Fix leak of uninitialized kernel data in SCLP report
While report_error_write() checks that the provided buffer is at least
as large as the header struct, but not that it is large enough to
contain the report with the length claimed by report->length. If
user-space provides a short buffer, meaning a larger report->length than
the actually written payload, up to around 4K of kernel data from past
the kmalloc(len + 1) sized buffer allocated in kernfs_fop_write_iter()
will leak into the SCLP report.
However, as the entity processing the SCLP is privileged and able to
access at least the page including the report, this does not leak data
that entity could not access but it is still an out of bounds read and
a malformed error report that should be rejected. |
| In the Linux kernel, the following vulnerability has been resolved:
net: mana: Reserve extra CQ slot for the fence completion CQE
The RX completion queue is sized to hold exactly one CQE per posted RX WQE.
MANA_FENCE_RQ makes hardware post an additional CQE_RX_OBJECT_FENCE after
the packet CQEs. The current sizing reserves no extra slot for it and in
rare cases, CQ has no guaranteed slot for the fence CQE when it is full of
packet CQEs. This can lead to dropping the fence completion while the
driver waits holding RTNL lock throughout the timeout duration.
Reserve one extra CQE slot for CQE_RX_OBJECT_FENCE. mana_gd_alloc_memory()
requires queue_size to be a power-of-two and at least MANA_PAGE_SIZE;
the reservation pushes cq_size past a power-of-two, so round up the CQ size
in mana_create_rxq(). |
| In the Linux kernel, the following vulnerability has been resolved:
zram: fix out-of-bounds access in writeback_store()
Patch series "zram: fix stale scan bounds after reinitialization".
Both writeback_store() and read_block_state() derive their table scan
bounds from zram->disksize before acquiring dev_lock. If the device is
reset and reinitialized with a smaller disksize between that read and lock
acquisition, the bound can describe the old table while the scan operates
on the new one. This can lead to out-of-bounds slot accesses.
Move both bound calculations under dev_lock so each bound remains
consistent with the table throughout its scan. Keep the fixes separate
because the affected interfaces originate from different commits and can
be backported independently.
This patch (of 2):
writeback_store() calculates the table scan bounds before taking dev_lock.
A reset followed by reconfiguration with a smaller disksize can therefore
replace zram->table while writeback_store() is waiting for the lock. Once
it acquires the lock, it sees an initialized device but scans the new
table using the old upper bound, resulting in an out-of-bounds access.
Calculate the number of pages while holding dev_lock so the scan bound
matches the table protected by the lock. |
| In the Linux kernel, the following vulnerability has been resolved:
fs/ntfs3: resize log->one_page_buf when adopting on-disk page size
log_replay() allocates log->one_page_buf using the page size that was
chosen from the host PAGE_SIZE:
log->one_page_buf = kmalloc(log->page_size, GFP_NOFS);
Later, when a restart area is found, the log page size recorded on disk
is adopted:
t32 = le32_to_cpu(log->rst_info.r_page->sys_page_size);
if (log->page_size != t32) {
log->l_size = log->orig_file_size;
log->page_size = norm_file_page(t32, &log->l_size,
t32 == DefaultLogPageSize);
}
If the on-disk page size is larger than the size used for the initial
allocation, log->page_size grows but one_page_buf is left at its
original, smaller size. A subsequent unaligned read_log_page() then
reads log->page_size bytes into the undersized scratch buffer:
page_buf = page_off ? log->one_page_buf : *buffer;
err = ntfs_read_run_nb_ra(ni->mi.sbi, &ni->file.run, page_vbo, page_buf,
log->page_size, NULL, &log->read_ahead);
overflowing the allocation. This is reachable when mounting a dirty
NTFS volume whose log was formatted with a page size larger than the
buffer initially allocated on the mounting host (for example a 64K-log
volume mounted on a host that allocated a 4K scratch buffer).
Grow one_page_buf when the adopted on-disk page size exceeds the size
used for the initial allocation. On krealloc() failure the original
buffer is left intact and freed by the existing error path. |
| In the Linux kernel, the following vulnerability has been resolved:
ksmbd: reject undersized DACLs before parsing ACEs
parse_dacl() limits the attacker-controlled ACE count by comparing it
with the number of minimal ACEs that fit in the DACL size. The DACL size
field is 16 bits, but the expression subtracts sizeof(struct smb_acl).
Because sizeof() is unsigned, a DACL size smaller than the ACL header
underflows to a large size_t.
A malicious client can reach this with:
SMB2_SET_INFO (InfoType=SMB2_O_INFO_SECURITY)
-> smb2_set_info_sec()
-> set_info_sec()
-> parse_sec_desc()
-> parse_dacl()
-> init_acl_state(..., 0xffff)
-> init_acl_state(..., 0xffff)
-> kmalloc_objs(..., 0xffff)
Thus a malformed security descriptor can make num_aces pass the guard
and drive large temporary ACL state and pointer-array allocations.
Reject DACLs smaller than struct smb_acl before doing the subtraction,
so the ACE count check cannot be bypassed by the underflow. |
| In the Linux kernel, the following vulnerability has been resolved:
dm-ioctl: fix a possible overflow in list_version_get_info
sizeof(tt->version) is 12 bytes, but the code writes 16 bytes into the
output buffer - info->vers->version[0], info->vers->version[1],
info->vers->version[2] and info->vers->next. This can cause buffer
overflow.
Fix this buffer overflow by replacing "sizeof(tt->version)" with
"sizeof(struct dm_target_versions)". |
| In the Linux kernel, the following vulnerability has been resolved:
xfrm: account XFRMA_IF_ID in aevent size calculation
xfrm_get_ae() allocates the reply skb with xfrm_aevent_msgsize(), then
build_aevent() appends attributes including XFRMA_IF_ID when x->if_id is
set.
xfrm_aevent_msgsize() does not include space for XFRMA_IF_ID. For states
with if_id, build_aevent() can fail with -EMSGSIZE and hit BUG_ON(err < 0)
in xfrm_get_ae(), turning a malformed netlink interaction into a kernel
panic.
Account XFRMA_IF_ID in the size calculation unconditionally and replace
the BUG_ON with normal error unwinding. |
| In the Linux kernel, the following vulnerability has been resolved:
ksmbd: validate response sizes in ipc_validate_msg()
ipc_validate_msg() computes the expected message size for each
response type by adding (or multiplying) attacker-controlled fields
from the daemon response to a fixed struct size in unsigned int
arithmetic. Three cases can overflow:
KSMBD_EVENT_RPC_REQUEST:
msg_sz = sizeof(struct ksmbd_rpc_command) + resp->payload_sz;
KSMBD_EVENT_SHARE_CONFIG_REQUEST:
msg_sz = sizeof(struct ksmbd_share_config_response) +
resp->payload_sz;
KSMBD_EVENT_LOGIN_REQUEST_EXT:
msg_sz = sizeof(struct ksmbd_login_response_ext) +
resp->ngroups * sizeof(gid_t);
resp->payload_sz is __u32 and resp->ngroups is __s32. Each addition
can wrap in unsigned int; the multiplication by sizeof(gid_t) mixes
signed and size_t, so a negative ngroups is converted to SIZE_MAX
before the multiply. A wrapped value of msg_sz that happens to
equal entry->msg_sz bypasses the size check on the next line, and
downstream consumers (smb2pdu.c:6742 memcpy using rpc_resp->payload_sz,
kmemdup in ksmbd_alloc_user using resp_ext->ngroups) then trust the
unverified length.
Use check_add_overflow() on the RPC_REQUEST and SHARE_CONFIG_REQUEST
paths to detect integer overflow without constraining functional
payload size; userspace ksmbd-tools grows NDR responses in 4096-byte
chunks for calls like NetShareEnumAll, so a hard transport cap is
unworkable on the response side. For LOGIN_REQUEST_EXT, reject
resp->ngroups outside the signed [0, NGROUPS_MAX] range up front and
report the error from ipc_validate_msg() so it fires at the IPC
boundary; with that bound the subsequent multiplication and addition
stay well below UINT_MAX. The now-redundant ngroups check and
pr_err in ksmbd_alloc_user() are removed.
This is the response-side analogue of aab98e2dbd64 ("ksmbd: fix
integer overflows on 32 bit systems"), which hardened the request
side. |
| In the Linux kernel, the following vulnerability has been resolved:
ipv4: nexthop: allocate skb dynamically in rtm_get_nexthop()
When querying a nexthop object via RTM_GETNEXTHOP, the kernel currently
allocates a fixed-size skb using NLMSG_GOODSIZE. While sufficient for
single nexthops and small Equal-Cost Multi-Path groups, this fixed
allocation fails for large nexthop groups like 512 nexthops.
This results in the following warning splat:
WARNING: net/ipv4/nexthop.c:3395 at rtm_get_nexthop+0x176/0x1c0, CPU#20: rep/4608
[...]
RIP: 0010:rtm_get_nexthop (net/ipv4/nexthop.c:3395)
[...]
Call Trace:
<TASK>
rtnetlink_rcv_msg (net/core/rtnetlink.c:6989)
netlink_rcv_skb (net/netlink/af_netlink.c:2550)
netlink_unicast (net/netlink/af_netlink.c:1319 net/netlink/af_netlink.c:1344)
netlink_sendmsg (net/netlink/af_netlink.c:1894)
____sys_sendmsg (net/socket.c:721 net/socket.c:736 net/socket.c:2585)
___sys_sendmsg (net/socket.c:2641)
__sys_sendmsg (net/socket.c:2671)
do_syscall_64 (arch/x86/entry/syscall_64.c:63 arch/x86/entry/syscall_64.c:94)
entry_SYSCALL_64_after_hwframe (arch/x86/entry/entry_64.S:130)
</TASK>
Fix this by allocating the size dynamically using nh_nlmsg_size() and
using nlmsg_new(), this is consistent with nexthop_notify() behavior. In
addition, adjust nh_nlmsg_size_grp() so it calculates the size needed
based on flags passed. While at it, also add the size of NHA_FDB for
nexthop group size calculation as it was missing too.
This cannot be reproduced via iproute2 as the group size is currently
limited and the command fails as follows:
addattr_l ERROR: message exceeded bound of 1048 |
| In the Linux kernel, the following vulnerability has been resolved:
ksmbd: fix OOB write in QUERY_INFO for compound requests
When a compound request such as READ + QUERY_INFO(Security) is received,
and the first command (READ) consumes most of the response buffer,
ksmbd could write beyond the allocated buffer while building a security
descriptor.
The root cause was that smb2_get_info_sec() checked buffer space using
ppntsd_size from xattr, while build_sec_desc() often synthesized a
significantly larger descriptor from POSIX ACLs.
This patch introduces smb_acl_sec_desc_scratch_len() to accurately
compute the final descriptor size beforehand, performs proper buffer
checking with smb2_calc_max_out_buf_len(), and uses exact-sized
allocation + iov pinning. |
| In the Linux kernel, the following vulnerability has been resolved:
ice: change XDP RxQ frag_size from DMA write length to xdp.frame_sz
The only user of frag_size field in XDP RxQ info is
bpf_xdp_frags_increase_tail(). It clearly expects whole buff size instead
of DMA write size. Different assumptions in ice driver configuration lead
to negative tailroom.
This allows to trigger kernel panic, when using
XDP_ADJUST_TAIL_GROW_MULTI_BUFF xskxceiver test and changing packet size to
6912 and the requested offset to a huge value, e.g.
XSK_UMEM__MAX_FRAME_SIZE * 100.
Due to other quirks of the ZC configuration in ice, panic is not observed
in ZC mode, but tailroom growing still fails when it should not.
Use fill queue buffer truesize instead of DMA write size in XDP RxQ info.
Fix ZC mode too by using the new helper. |
| In the Linux kernel, the following vulnerability has been resolved:
KVM: SEV: Compute the correct max length of the in-GHCB scratch area
When setting the length of the GHCB scratch area, and the area is in the
GHCB shared buffer, set the effective length of the scratch area to the max
possible size given the start of the guest-provided pointer, and the end of
the shared buffer.
The code was "fine" when first introduced, as KVM doesn't consult the
length of the buffer when emulating MMIO, because the passed in @len always
specifies the *max* size required. But for PSC requests, the incoming @len
is just the minimum length (to process the header), and KVM needs to know
the full size of the scratch area to avoid buffer overflows (spoiler alert).
Opportunistically rename @len => @min_len to better reflect its role. |
| EDK2 contains a vulnerability in BIOS where a user may cause “Out-of-bounds
Write”, Classic
Buffer Overflow, and “Incorrect Calculation of Buffer Size” by remote access. Successful exploitation of this vulnerability
can lead to arbitrary
code execution. It could also impact
Confidentiality,
Integrity,
and Availability. |
| Vyper before 0.2.6 contains a call stack corruption vulnerability that causes incorrect function outputs when complex types with non-base members are passed as arguments. Contracts passing multi-dimensional arrays or structs to internal or external functions receive corrupted values because the compiler assumed each subtype size is 32. |
| Asterisk is an open source private branch exchange and telephony toolkit. Prior to Asterisk 20.20.1, 21.12.3, 22.10.1, 23.4.1 and Certified Asterisk 20.7-cert11, 22.8-cert3, an authenticated attacker may cause a heap buffer overflow through an out-of-bounds write in the `Codec2` decoder caused by a `floor/ceil sample-count mismatch`. The `codec_codec2` module must be loaded and `Codec2` must be configured on the attacked endpoint. The attacker must pass SIP authentication by username/password or `source IP address matching`, establish a call using `Codec2`, and send carefully crafted `Codec2` audio packets. This issue is fixed in Asterisk 20.20.1, 21.12.3, 22.10.1, 23.4.1 and Certified Asterisk 20.7-cert11, 22.8-cert3. |
| A heap-based buffer overflow vulnerability in the Fireware OS authentication service allows an attacker who controls or intercepts traffic to the configured Active Directory server to create a denial of service condition and potentially execute arbitrary code by returning a specially crafted response. |
| A heap-based buffer overflow vulnerability exists in the Fireware OS authentication service allows an attacker who controls or intercepts traffic to the configured Active Directory server to create a denial of service condition and potentially execute arbitrary code by returning a specially crafted response. |
