| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
Input: atmel_mxt_ts - fix boundary check in mxt_prepare_cfg_mem
When a configuration file provides an object size that is larger than the
driver's known mxt_obj_size(object), the driver intends to discard the
extra bytes.
The loop iterates using for (i = 0; i < size; i++). Inside the loop, the
condition to skip processing extra bytes is:
if (i > mxt_obj_size(object))
continue;
Since i is a 0-based index, the valid indices for the object are 0 through
mxt_obj_size(object) - 1.
When i == mxt_obj_size(object), the condition evaluates to false, and the
code processes the byte instead of discarding it.
This causes the code to calculate byte_offset = reg + i - cfg->start_ofs
and writes the byte there, overwriting exactly one byte of the adjacent
instance or object.
Update the boundary check to skip extra bytes correctly by using >=. |
| In the Linux kernel, the following vulnerability has been resolved:
uio: uio_pci_generic_sva: fix double free of devm_kzalloc() memory
uio_pci_sva allocates struct uio_pci_sva_dev with devm_kzalloc() in
probe(), but then calls kfree(udev) both on the probe() error path
(label out_free) and again in remove().
Because devm_kzalloc() allocations are devres-managed and are freed
automatically when the device is detached (including after a failing
probe() and during driver unbind), the explicit kfree() can lead to a
double free.
If probe() fails after devm_kzalloc(), the error path frees udev and
devres cleanup will free it again when the core unwinds the partially
bound device. On normal driver removal, remove() frees udev and devres
will free it again when the device is detached.
This issue was identified by a static analysis tool I developed and
confirmed by manual review. Fix by removing the manual kfree() calls
and dropping the now-unused label. |
| In the Linux kernel, the following vulnerability has been resolved:
usb: musb: omap2430: Fix use-after-free in omap2430_probe()
In omap2430_probe(), of_node_put(np) is called prematurely before the
last access to np, leading to a use-after-free if the node's reference
count drops to zero. Move the of_node_put() calls after the last use of
np in both the success and error paths. |
| In the Linux kernel, the following vulnerability has been resolved:
usbip: vudc: Fix use after free bug in vudc_remove due to race condition
This patch follows up Zheng Wang's 2023 report of a use-after-free in
vudc_remove(). The original thread stalled on Shuah Khan's request for
runtime testing of the unplug/unbind path. This patch supplies that
testing and keeps Zheng's original fix shape.
In vudc_probe(), v_init_timer() binds udc->tr_timer.timer to v_timer().
usbip_sockfd_store() starts the timer via v_start_timer()/v_kick_timer().
vudc_remove() can then free the containing struct vudc while the timer is
still pending or executing.
KASAN confirms the race on an unpatched x86_64 QEMU guest with
CONFIG_KASAN=y, CONFIG_USBIP_VUDC=y, CONFIG_USB_ZERO=y, and a tight loop
that repeatedly writes a socket fd to usbip_sockfd, closes the socket
pair, and unbinds/rebinds usbip-vudc.0:
BUG: KASAN: slab-use-after-free in __run_timer_base.part.0+0x8ba/0x8e0
Write of size 8 at addr ffff888001b80740 by task trigger_and_unb/239
Allocated by task 239:
vudc_probe+0x4d/0xaa0
Freed by task 239:
kfree+0x18f/0x520
device_release_driver_internal+0x388/0x540
unbind_store+0xd9/0x100
This lands in the timer core rather than v_timer() itself because the
embedded timer_list is being walked after its containing struct vudc has
already been freed. The underlying lifetime bug is the same one Zheng
reported.
With v_stop_timer() called from vudc_remove() and the timer deleted
synchronously, the same harness completed 5000 bind/unbind iterations
with no KASAN report. |
| In the Linux kernel, the following vulnerability has been resolved:
usb: usbtmc: check URB actual_length for interrupt-IN notifications
USBTMC devices can use an optional interrupt endpoint for notification
messages. These typically contain two-byte headers indicating the
payload format, but the driver does not check if these headers are
present before accessing the data buffers. In cases where the URB
actual_length is not enough to fit these headers, the driver will either
cause an out-of-bounds read, or consume stale leftover data from a
previous notification.
Fix by checking if actual_data contains enough bytes for the headers,
otherwise resubmit URB to the interrupt endpoint. |
| In the Linux kernel, the following vulnerability has been resolved:
USB: serial: belkin_sa: validate interrupt status length
The Belkin interrupt callback treats interrupt data as a four-byte
status report and reads LSR/MSR fields at offsets 2 and 3. The
interrupt-in buffer length is derived from endpoint wMaxPacketSize, and
short interrupt transfers may complete successfully with a smaller
actual_length.
Check the completed interrupt packet length before parsing status
fields so short interrupt endpoints and short successful packets are
ignored instead of causing out-of-bounds or stale status-byte reads.
KASAN report as below:
BUG: KASAN: slab-out-of-bounds in belkin_sa_read_int_callback()
Read of size 1
Call trace:
belkin_sa_read_int_callback() (drivers/usb/serial/belkin_sa.c:202)
__usb_hcd_giveback_urb() (drivers/usb/core/hcd.c:1630)
dummy_timer() (?:?) |
| In the Linux kernel, the following vulnerability has been resolved:
USB: serial: cypress_m8: validate interrupt packet headers
cypress_read_int_callback() parses the interrupt-in buffer according to
the selected Cypress packet format. Format 1 has a two-byte status/count
header and format 2 has a one-byte combined status/count header. The
usb-serial core sizes the interrupt-in buffer from the endpoint
descriptor's wMaxPacketSize, and successful interrupt transfers can
complete short when URB_SHORT_NOT_OK is not set.
Check that the completed packet contains the selected header before
reading it. Malformed short reports are ignored and the interrupt URB is
resubmitted through the existing retry path, preventing out-of-bounds
header-byte reads.
KASAN report as below:
KASAN slab-out-of-bounds in cypress_read_int_callback+0x240/0x7f0
Read of size 1
Call trace:
cypress_read_int_callback() (drivers/usb/serial/cypress_m8.c:1009)
__usb_hcd_giveback_urb()
dummy_timer()
[ johan: use constants in header length sanity checks ] |
| In the Linux kernel, the following vulnerability has been resolved:
USB: serial: digi_acceleport: fix memory corruption with small endpoints
Add the missing bulk-out buffer size sanity checks to avoid
out-of-bounds memory accesses or slab corruption should a malicious
device report smaller buffers than expected. |
| In the Linux kernel, the following vulnerability has been resolved:
USB: serial: keyspan: fix missing indat transfer sanity check
Add the missing sanity check on the size of usa49wg indat transfers to
avoid parsing stale or uninitialised slab data. |
| In the Linux kernel, the following vulnerability has been resolved:
USB: serial: mxuport: fix memory corruption with small endpoint
Make sure that the bulk-out endpoint max packet size is at least eight
bytes to avoid user-controlled slab corruption should a malicious device
report a smaller size. |
| In the Linux kernel, the following vulnerability has been resolved:
USB: serial: mct_u232: fix memory corruption with small endpoint
The driver overrides the maximum transfer size for a specific device
which only accepts 16 byte packets for its 32 byte bulk-out endpoint.
Make sure to never increase the maximum transfer size to prevent slab
corruption should a malicious device report a smaller endpoint max
packet size than expected. |
| In the Linux kernel, the following vulnerability has been resolved:
USB: serial: mct_u232: fix missing interrupt-in transfer sanity check
Add the missing sanity check on the size of interrupt-in transfers to
avoid parsing stale or uninitialised slab data (and leaking it to user
space). |
| In the Linux kernel, the following vulnerability has been resolved:
usb: gadget: composite: fix integer underflow in WebUSB GET_URL handling
The WebUSB GET_URL handler in composite_setup() narrows
landing_page_length to fit the host-supplied wLength using
landing_page_length = w_length
- WEBUSB_URL_DESCRIPTOR_HEADER_LENGTH + landing_page_offset;
If wLength is smaller than WEBUSB_URL_DESCRIPTOR_HEADER_LENGTH the
unsigned subtraction wraps, and the subsequent
memcpy(url_descriptor->URL,
cdev->landing_page + landing_page_offset,
landing_page_length - landing_page_offset);
ends up copying close to UINT_MAX bytes from cdev->landing_page into
cdev->req->buf. KASAN reports a slab-out-of-bounds in composite_setup
on the kmalloc-2k gadget_info allocation, and FORTIFY_SOURCE traps the
memcpy as a 4294967293-byte field-spanning write into
url_descriptor->URL (size 252).
A USB host can reach this from a single SETUP packet against any
gadget that has webusb/use=1 and a landingPage configured.
Handle the small-wLength case before the math: when the host requested
fewer bytes than the URL descriptor header, only the header is
meaningful and no URL bytes need to be copied. Setting
landing_page_length to landing_page_offset makes the existing memcpy a
no-op and leaves the descriptor returned to the host unchanged for all
larger wLength values. |
| In the Linux kernel, the following vulnerability has been resolved:
usb: gadget: f_fs: copy only received bytes on short ep0 read
ffs_ep0_read() allocates its control-OUT data buffer with
kmalloc() (not kzalloc) at the Length value from the Setup
packet, then copies that full len to userspace regardless of
how many bytes were actually received:
data = kmalloc(len, GFP_KERNEL);
...
ret = __ffs_ep0_queue_wait(ffs, data, len);
if ((ret > 0) && (copy_to_user(buf, data, len)))
ret = -EFAULT;
__ffs_ep0_queue_wait() returns req->actual, which on a short
control OUT transfer is strictly less than len. The
copy_to_user() call still copies len bytes, so on a short OUT
the last (len - ret) bytes of the kmalloc() buffer --
uninitialised slab residue -- are delivered to the FunctionFS
daemon.
Short ep0 OUT completions are specified USB control-transfer
behavior and are produced by in-tree UDCs:
* dwc2 continues on req->actual < req->length for ep0 DATA OUT
(short-not-ok is the only ep0-OUT stall path).
* aspeed_udc ends ep0 OUT on rx_len < ep->ep.maxpacket.
* renesas_usbf logs "ep0 short packet" and completes the
request.
* dwc3 stalls on short IN but not on short OUT.
A short ep0 OUT is therefore not evidence of a broken UDC; it is
a normal condition f_fs has to cope with. The sibling gadgetfs
implementation in drivers/usb/gadget/legacy/inode.c already does
this correctly via min(len, dev->req->actual) before
copy_to_user(). This patch brings f_fs.c to the same safe
pattern rather than trimming at a defensive layer.
The bug is reached from the FunctionFS device node, which in
real deployments is owned by the privileged gadget daemon
(adbd, UMS, composite gadget services, etc.); it is not
reachable from unprivileged userspace. Linux host stacks
normally reject short-wLength control OUTs before they reach
the gadget, so reproducing this required a build that
bypasses that host-side check. With the bypass in place, a
1-byte payload on a 64-byte Setup produces 63 bytes of
non-canary slab residue in the daemon's read buffer.
Fix by copying only ret (actually received) bytes to
userspace. |
| In the Linux kernel, the following vulnerability has been resolved:
usb: gadget: f_fs: serialize DMABUF cancel against request completion
ffs_epfile_dmabuf_io_complete() calls usb_ep_free_request() on the
completed request but leaves priv->req, the back-pointer that
ffs_dmabuf_transfer() set on submission, pointing at the freed
memory. A later FUNCTIONFS_DMABUF_DETACH ioctl or
ffs_epfile_release() on the close path still sees priv->req
non-NULL under ffs->eps_lock:
if (priv->ep && priv->req)
usb_ep_dequeue(priv->ep, priv->req);
so usb_ep_dequeue() is called on a freed usb_request.
On dummy_hcd the dequeue path only walks a live queue and
pointer-compares, so the freed pointer reads without faulting and
KASAN requires an explicit check at the FunctionFS call site to
surface the use-after-free. On SG-capable in-tree UDCs the
dequeue path dereferences the supplied request immediately:
* chipidea's ep_dequeue() does
container_of(req, struct ci_hw_req, req) and reads
hwreq->req.status before acquiring its own lock.
* cdnsp's cdnsp_gadget_ep_dequeue() reads request->status first.
The narrower option of clearing priv->req via cmpxchg() in the
completion does not close the race: the completion runs without
eps_lock, so a cancel path holding eps_lock can still observe
priv->req non-NULL, race a concurrent completion that clears and
frees, and pass the freed pointer to usb_ep_dequeue(). A slightly
longer fix that moves the free into the cleanup work is needed.
Same class of lifetime race as the recent usbip-vudc timer fix [1].
Take eps_lock in the sole place that mutates priv->req from the
callback direction by moving usb_ep_free_request() out of the
completion into ffs_dmabuf_cleanup(), the existing work handler
scheduled by ffs_dmabuf_signal_done() on
ffs->io_completion_wq. Clear priv->req there under eps_lock
before freeing, and only clear if priv->req still names our
request (a subsequent ffs_dmabuf_transfer() on the same
attachment may have queued a new one).
This keeps the existing dummy_hcd sync-dequeue invariant: the
completion callback is still invoked by the UDC without
eps_lock held (dummy_hcd drops its own lock before calling the
callback), and the callback now takes no f_fs lock at all.
Serialization against the cancel path happens in cleanup, which
runs from the workqueue with no f_fs lock held on entry.
The priv ref count protects the containing ffs_dmabuf_priv:
ffs_dmabuf_transfer() takes a ref via ffs_dmabuf_get(), cleanup
drops it via ffs_dmabuf_put(), so priv stays live for the
cleanup even after the cancel path's list_del + ffs_dmabuf_put.
The ffs_dmabuf_transfer() error path no longer frees usb_req
inline: fence->req and fence->ep are set before usb_ep_queue(),
so ffs_dmabuf_cleanup() (scheduled by the error-path
ffs_dmabuf_signal_done()) owns the free regardless of whether
the queue succeeded.
Reproduced under KASAN on both detach and close paths against
dummy_hcd with an observability hook
(kasan_check_byte(priv->req) immediately before usb_ep_dequeue)
at the two FunctionFS cancel sites to surface the stale-pointer
access; the hook is not part of this patch. The KASAN
allocator / free stacks in the captured splats identify the
same request: alloc in dummy_alloc_request, free in
dummy_timer, fault reached from ffs_epfile_release (close) and
from the FUNCTIONFS_DMABUF_DETACH ioctl (detach). With the
patch applied, both paths are silent under the same hook.
The bug is reached from the FunctionFS device node, which in
real deployments is owned by the privileged gadget daemon
(adbd, UMS, composite gadget services, etc.); it is not
reachable from unprivileged userspace or from a USB host on the
cable. FunctionFS mounts default to GLOBAL_ROOT_UID, but the
filesystem supports uid=, gid=, and fmode= delegation to a
non-root gadget daemon, so on real deployments the attacker may
be a less-privileged service rather than root. |
| In the Linux kernel, the following vulnerability has been resolved:
thunderbolt: property: Reject u32 wrap in tb_property_entry_valid()
entry->value is u32 and entry->length is u16; the sum is performed in
u32 and wraps. A malicious XDomain peer can pick
value = 0xffffff00, length = 0x100 so the sum 0x100000000 wraps to 0
and passes the > block_len check. tb_property_parse() then passes
entry->value to parse_dwdata() as a dword offset into the property
block, reading attacker-directed memory far past the allocation.
For TEXT-typed entries with the "deviceid" or "vendorid" keys this
lands in xd->device_name / xd->vendor_name and is readable back via
the per-XDomain device_name / vendor_name sysfs attributes; the leak
is NUL-bounded (kstrdup() stops at the first zero byte) and
untargeted (the attacker picks a delta, not an absolute address).
DATA-typed entries are parsed into property->value.data but not
generically surfaced to userspace.
Use check_add_overflow() so a wrapped sum is rejected. |
| In the Linux kernel, the following vulnerability has been resolved:
thunderbolt: property: Reject dir_len < 4 to prevent size_t underflow
On the non-root path, __tb_property_parse_dir() takes dir_len from
entry->length (u16 widened to size_t). Two distinct OOB conditions
follow when entry->length < 4:
1. The non-root path begins with kmemdup(&block[dir_offset],
sizeof(*dir->uuid), ...) which always reads 4 dwords from
dir_offset. tb_property_entry_valid() only enforces
dir_offset + entry->length <= block_len, so a crafted entry
with dir_offset close to the end of the property block and
entry->length in 0..3 passes that gate but lets the UUID copy
run off the block (e.g. dir_offset = 497, dir_len = 3 in a
500-dword block reads block[497..501]).
2. After the kmemdup, content_len = dir_len - 4 underflows size_t
to ~SIZE_MAX, nentries becomes SIZE_MAX / 4, and the entry
walk runs OOB on each iteration until an entry fails
validation or the kernel oopses on an unmapped page.
Reject dir_len < 4 on the non-root path *before* the UUID kmemdup,
which closes both holes.
Also move INIT_LIST_HEAD(&dir->properties) up to immediately after
the dir allocation so the new error-return path (and the existing
uuid-alloc failure path) calling tb_property_free_dir() sees a
walkable list rather than the zero-initialized NULL next/prev that
list_for_each_entry_safe() would oops on. |
| In the Linux kernel, the following vulnerability has been resolved:
thunderbolt: property: Cap recursion depth in __tb_property_parse_dir()
A DIRECTORY entry's value field is used as the dir_offset for a
recursive call into __tb_property_parse_dir() with no depth counter.
A crafted peer that chains DIRECTORY entries into a back-reference
loop drives the parser until the kernel stack is exhausted and the
guard page fires. Any untrusted XDomain peer (cable, dock, in-line
inspector, adjacent host) that reaches the PROPERTIES_REQUEST
control-plane exchange can trigger this without authentication.
Thread a depth counter through tb_property_parse() and
__tb_property_parse_dir(), and reject blocks that exceed
TB_PROPERTY_MAX_DEPTH = 8. That is comfortably larger than any
observed legitimate XDomain layout.
Operators who do not need XDomain host-to-host discovery can disable
the path entirely with thunderbolt.xdomain=0 on the kernel command
line. |
| In the Linux kernel, the following vulnerability has been resolved:
scsi: fcoe: Reject FIP descriptors with zero fip_dlen in CVL walker
drivers/scsi/fcoe/fcoe_ctlr.c::fcoe_ctlr_recv_clr_vlink() advanced the
descriptor cursor by an attacker-supplied fip_dlen without ever
requiring dlen >= sizeof(struct fip_desc) in the default branch. The
named descriptor cases (FIP_DT_MAC, FIP_DT_NAME, FIP_DT_VN_ID) checked
their per-type minimum lengths, but a FIP_DT_NON_CRITICAL descriptor
(fip_dtype >= 128, which the standard requires receivers to silently
ignore) skipped that check entirely.
An unauthenticated L2 peer on the FCoE control VLAN could hang
fcoe_ctlr_recv_work on an fcoe, qedf, or bnx2fc initiator indefinitely
by emitting one FIP CVL frame whose single descriptor had fip_dtype ==
FIP_DT_NON_CRITICAL and fip_dlen == 0: the cursor advanced zero bytes
per iteration and the loop condition rlen >= sizeof(*desc) stayed true
forever, blocking every subsequent FIP frame on that controller.
Tighten the outer dlen guard to also reject dlen < sizeof(struct
fip_desc), so a malformed descriptor whose length cannot even cover the
descriptor header is rejected before the switch. This is the same
lower-bound the named cases already apply and is the minimum scope that
closes the loop. |
| In the Linux kernel, the following vulnerability has been resolved:
scsi: scsi_transport_fc: Widen FPIN pname walker counter to u32
An adjacent Fibre Channel fabric actor that can deliver an FPIN ELS
frame to an lpfc or qla2xxx Linux initiator can trigger a non-return in
the generic FC transport. This is not a local userspace or IP network
path; the attacker must be able to inject fabric traffic, for example as
a compromised switch or fabric controller, or as a same-zone N_Port on a
fabric that permits source spoofing.
The Link-Integrity and Peer-Congestion FPIN walkers used a u8 loop
counter against the 32-bit on-wire pname_count field, and did not bound
pname_count by the descriptor body already validated by the TLV walker.
A pname_count of 256 therefore wraps the counter and keeps the loop
condition true indefinitely.
Factor the shared pname_list[] walk into one helper, widen the counter
to u32, and clamp pname_count against the entries that fit in the
descriptor body before iterating. |
