| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
iommu/dma: Do not try to iommu_map a 0 length region in swiotlb
iommu_dma_iova_link_swiotlb() processes a mapping that is unaligned in three
parts, the head, middle and trailer. If the middle is empty because there
are no aligned pages it will call down to iommu_map() with a 0 size
which the iommupt implementation will fail as illegal.
It then tries to do an error unwind and starts from the wrong spot
corrupting the mapping so the eventual destruction triggers a WARN_ON.
Check for 0 length and avoid mapping and use offset not 0 as the starting
point to unlink.
This is frequently triggered by using some kinds of thunderbolt NVMe
drives that trigger forced SWIOTLB for unaligned memory. NVMe seems to
pass in oddly aligned buffers for the passthrough commands from smartctl
that hit this condition. |
| In the Linux kernel, the following vulnerability has been resolved:
rseq: Fix using an uninitialized stack variable in rseq_exit_user_update()
There is an bug in which an uninitialized stack variable is used in
rseq_exit_user_update() as reported by syzbot:
BUG: KMSAN: kernel-infoleak in rseq_set_ids_get_csaddr include/linux/rseq_entry.h:502 [inline]
The local variable:
struct rseq_ids ids = {
.cpu_id = task_cpu(t),
.mm_cid = task_mm_cid(t),
.node_id = cpu_to_node(ids.cpu_id),
};
According to the C standard, the evaluation order of expressions in an
initializer list is indeterminately sequenced. The compiler (Clang, in
this KMSAN build) evaluates `cpu_to_node(ids.cpu_id)` *before*
`ids.cpu_id` is initialized with `task_cpu(t)`.
This is fixed by moving the assignment of ids.node_id outside the
structure initialization. |
| In the Linux kernel, the following vulnerability has been resolved:
thunderbolt: Reject zero-length property entries in validator
tb_property_entry_valid() accepts entries with length == 0 for
DIRECTORY, DATA, and TEXT types. A zero-length TEXT entry passes
validation but causes an underflow in the null-termination logic:
property->value.text[property->length * 4 - 1] = '\0';
When property->length is 0 this writes to offset -1 relative to
the allocation.
Reject zero-length entries early in the validator since they have no
valid representation in the XDomain property protocol. |
| In the Linux kernel, the following vulnerability has been resolved:
net: ibm: emac: Fix use-after-free during device removal
The driver was using devm_register_netdev() which causes unregister_netdev()
to be deferred until the devres cleanup phase, which runs after emac_remove()
returns. This creates a use-after-free window where:
1. emac_remove() is called, which tears down hardware (cancels work, detaches
modules, unregisters from MAL)
2. emac_remove() returns
3. devres cleanup runs and finally calls unregister_netdev()
During step 3, the network stack might still process packets, triggering
emac_irq(), emac_poll(), or other handlers that access now-freed hardware
resources (dev->emacp, dev->mal, etc.).
Fix this by replacing devm_register_netdev() with manual register_netdev()
and calling unregister_netdev() at the beginning of emac_remove(), before
any hardware teardown. This ensures the network device is fully stopped and
unregistered before hardware resources are released.
The change is safe because:
- dev->ndev is assigned very early in probe (before any error paths that
could bypass emac_remove)
- platform_set_drvdata() is only called after successful registration, so
emac_remove() only runs for fully registered devices
- unregister_netdev() is idempotent and safe to call on any registered device |
| In the Linux kernel, the following vulnerability has been resolved:
netfilter: x_tables: avoid leaking percpu counter pointers
The native and compat get-entries paths copy the fixed rule entry header
from the kernelized rule blob to userspace before overwriting the entry's
counter fields with a sanitized counter snapshot.
On SMP kernels, entry->counters.pcnt contains the percpu allocation
address used by x_tables rule counters. A caller can provide a userspace
buffer that faults during the initial fixed-header copy after pcnt has
been copied but before the later sanitized counter copy runs. The syscall
then returns -EFAULT while leaving the raw percpu pointer in userspace.
Copy only the fixed entry prefix before counters from the kernelized rule
blob, then copy the sanitized counter snapshot into the counter field.
Apply this ordering to the IPv4, IPv6, and ARP native and compat
get-entries implementations so a fault cannot expose the internal percpu
counter pointer. |
| In the Linux kernel, the following vulnerability has been resolved:
net: phy: don't try to setup PHY-driven SFP cages when using genphy
We don't have support for PHY-driver SFP cages with the genphy code.
On top of that, it was found by sashiko that running
sfp_bus_add_upstream() for genphy deadlocks, as for genphy the PHY
probing runs under RTNL, which isn't the case for non-genphy drivers.
This problem was reproduced, and does lead to a deadlock on RTNL.
Before the blamed commit, the phy_sfp_probe() call was made by
individual PHY drivers, so there was no way to get to the SFP probing
path when using genphy.
Let's therefore only run phy_sfp_probe when not using genphy. |
| In the Linux kernel, the following vulnerability has been resolved:
accel/ivpu: Add bounds check for firmware runtime memory
Validate that the firmware runtime memory specified in the image
header is properly aligned and sized to hold the firmware image.
This prevents errors during memory allocation and image transfer. |
| In the Linux kernel, the following vulnerability has been resolved:
drm/amd/display: Fix NULL deref and buffer over-read in SDP debugfs
[Why & How]
dp_sdp_message_debugfs_write() dereferences connector->base.state->crtc
without checking for NULL. A connector can be connected but not bound to
any CRTC (e.g. after hot-plug before the next atomic commit), causing a
kernel crash when writing to the sdp_message debugfs node.
The function also ignores the user-provided size argument and always
passes 36 bytes to copy_from_user(), reading past the user buffer when
size < 36.
Fix both issues by:
- Returning -ENODEV when connector->base.state or state->crtc is NULL
- Clamping write_size to min(size, sizeof(data))
(cherry picked from commit 6ab4c36a522842ff70474a1c0af2e40e50fc8300) |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Fix abuse of kprobe_write_ctx via freplace
uprobe programs are allowed to modify struct pt_regs.
Since the actual program type of uprobe is KPROBE, it can be abused to
modify struct pt_regs via kprobe+freplace when the kprobe attaches to
kernel functions.
For example,
SEC("?kprobe")
int kprobe(struct pt_regs *regs)
{
return 0;
}
SEC("?freplace")
int freplace_kprobe(struct pt_regs *regs)
{
regs->di = 0;
return 0;
}
freplace_kprobe prog will attach to kprobe prog.
kprobe prog will attach to a kernel function.
Without this patch, when the kernel function runs, its first arg will
always be set as 0 via the freplace_kprobe prog.
To fix the abuse of kprobe_write_ctx=true via kprobe+freplace, disallow
attaching freplace programs on kprobe programs with different
kprobe_write_ctx values. |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Switch CONFIG_CFI_CLANG to CONFIG_CFI
This was renamed in commit 23ef9d439769 ("kcfi: Rename CONFIG_CFI_CLANG
to CONFIG_CFI") as it is now a compiler-agnostic option. Using the wrong
name results in the code getting compiled out. Meaning the CFI failures
for btf_dtor_kfunc_t would still trigger. |
| In plain terms, Apache Polaris is supposed to issue short-lived GCS credentials
that
only work for one table's files, but a crafted namespace or table name can
cause those credentials to work across the configured bucket instead.
Apache Polaris builds Google Cloud Storage downscoped credentials by creating a
Credential Access Boundary (CAB) with CEL conditions that are intended to
restrict access to the requested table's storage path.
The relevant CEL string is built from the bucket name and the table path.
That
table path is derived from namespace and table identifiers. In current code,
that path appears to be inserted into the CEL expression without escaping.
As a result, a namespace or table identifier containing a single quote and
other URI-safe CEL fragments can break out of the intended quoted string and
change the meaning of the CEL condition.
In private testing against Polaris 1.4.0 on real Google Cloud Storage, it was confirmed that Polaris accepted a crafted identifier and returned delegated
GCS
credentials whose CEL path restriction had effectively collapsed.
Those delegated credentials could then:
- list another table's object prefix;
- read another table's metadata control file (Iceberg metadata JSON);
- create and delete an object under another table's object prefix;
- and also list, read, create, and delete objects under an unrelated
external
prefix in the same bucket that was not part of any table path.
That last point is important. The issue is not limited to "another table".
In
the confirmed setup, once Apache Polaris returned credentials for the crafted
table,
the path restriction inside the configured bucket was effectively gone.
The practical effect is that temporary credentials for one crafted table
can be
broader than the table Polaris was asked to authorize, and can become
effectively bucket-wide within the configured bucket.
The current GCS testing used a Polaris principal with broad catalog
privileges for setup. A separate least-privilege Polaris RBAC variant
has not yet been tested on GCS. However, the storage-credential
broadening behavior itself has been confirmed on GCS. |
| Apache Polaris accepts literal `*` characters in namespace and table names. When it
later builds temporary S3 access policies for delegated table access, those
same characters appear to be reused unescaped in S3 IAM resource patterns
and
`s3:prefix` conditions.
In S3 IAM policy matching, `*` is treated as a wildcard rather than as
ordinary text. That means temporary credentials issued for one crafted table
can match the storage path of a different table.
In private testing against Polaris 1.4.0 using Polaris' AWS S3 temporary-
credential path on both MinIO and real AWS S3, credentials returned for
crafted tables such as `f*.t1`, `f*.*`, `*.*`, and `foo.*` could reach other
tables' S3 locations.
The confirmed behavior includes:
- reading another table's metadata control file ([Iceberg metadata JSON]);
- listing another table's exact S3 table prefix ([table prefix]);
- and, when write delegation was returned for the crafted table, creating
and
deleting an object under another table's exact S3 table prefix.
A control case using ordinary different names did not allow the same
cross-table access.
A least-privilege AWS S3 variant was also confirmed in which the attacker
principal had no Polaris permissions on the victim table and only the
minimal permissions required to create and use a crafted wildcard table
(namespace-scoped `TABLE_CREATE` and `TABLE_WRITE_DATA` on `*`). In that
setup, direct Polaris access to `foo.t1` remained forbidden, but the
attacker
could still create and load `*.*`, receive delegated S3 credentials, and use
those credentials to list, read, create, and delete objects under `foo.t1`.
In Iceberg, the metadata JSON file is a control file: it tells readers which
data files belong to the table, which snapshots exist, and which table
version
to read. So unauthorized access to it is already a meaningful
confidentiality
problem. The confirmed write-capable variant means the issue is not limited
to
disclosure. |
| Apache Polaris can issue broad temporary ("vended") storage credentials during
staged
table creation before the effective table location has been validated or
durably reserved.
Those temporary credentials are meant to limit the scope
of
accessible table data and metadata, but this scope limitation becomes
attacker-
directed because the attacker can choose a reachable target location.
In the confirmed variant, if the caller supplies a custom `location` during
stage create and requests credential vending, Apache Polaris uses that location to
construct delegated storage credentials immediately. The stage-create path
itself neither runs the normal location validation nor the overlap checks
before those credentials are issued.
Closely related to that, the staged-create flow also accepts
`write.data.path` / `write.metadata.path` in the request properties and
feeds
those location overrides into the same effective table location set used for
credential vending. Those fields are secondary to the main custom-`location`
exploit, but they are still attacker-influenced location inputs that should
be
validated before any credentials are issued. |
| CTMS and CPAS developed by Sunnet has an Arbitrary File Upload vulnerability, allowing privileged remote attackers to upload and execute web shell backdoors, thereby enabling arbitrary code execution on the server. |
| Axios is a promise based HTTP client for the browser and Node.js. Prior to 1.15.0 and 0.3.1, the Axios library is vulnerable to a specific "Gadget" attack chain that allows Prototype Pollution in any third-party dependency to be escalated into Remote Code Execution (RCE) or Full Cloud Compromise (via AWS IMDSv2 bypass). This vulnerability is fixed in 1.15.0 and 0.3.1. |
| Issue summary: Applications using RSASVE key encapsulation to establish
a secret encryption key can send contents of an uninitialized memory buffer to
a malicious peer.
Impact summary: The uninitialized buffer might contain sensitive data from the
previous execution of the application process which leads to sensitive data
leakage to an attacker.
RSA_public_encrypt() returns the number of bytes written on success and -1
on error. The affected code tests only whether the return value is non-zero.
As a result, if RSA encryption fails, encapsulation can still return success to
the caller, set the output lengths, and leave the caller to use the contents of
the ciphertext buffer as if a valid KEM ciphertext had been produced.
If applications use EVP_PKEY_encapsulate() with RSA/RSASVE on an
attacker-supplied invalid RSA public key without first validating that key,
then this may cause stale or uninitialized contents of the caller-provided
ciphertext buffer to be disclosed to the attacker in place of the KEM
ciphertext.
As a workaround calling EVP_PKEY_public_check() or
EVP_PKEY_public_check_quick() before EVP_PKEY_encapsulate() will mitigate
the issue.
The FIPS modules in 3.6, 3.5, 3.4, 3.3, 3.1 and 3.0 are affected by this issue. |
| Issue summary: Converting an excessively large OCTET STRING value to
a hexadecimal string leads to a heap buffer overflow on 32 bit platforms.
Impact summary: A heap buffer overflow may lead to a crash or possibly
an attacker controlled code execution or other undefined behavior.
If an attacker can supply a crafted X.509 certificate with an excessively
large OCTET STRING value in extensions such as the Subject Key Identifier
(SKID) or Authority Key Identifier (AKID) which are being converted to hex,
the size of the buffer needed for the result is calculated as multiplication
of the input length by 3. On 32 bit platforms, this multiplication may overflow
resulting in the allocation of a smaller buffer and a heap buffer overflow.
Applications and services that print or log contents of untrusted X.509
certificates are vulnerable to this issue. As the certificates would have
to have sizes of over 1 Gigabyte, printing or logging such certificates
is a fairly unlikely operation and only 32 bit platforms are affected,
this issue was assigned Low severity.
The FIPS modules in 3.6, 3.5, 3.4, 3.3 and 3.0 are not affected by this
issue, as the affected code is outside the OpenSSL FIPS module boundary. |
| In the Linux kernel, the following vulnerability has been resolved:
crypto: algif_aead - Revert to operating out-of-place
This mostly reverts commit 72548b093ee3 except for the copying of
the associated data.
There is no benefit in operating in-place in algif_aead since the
source and destination come from different mappings. Get rid of
all the complexity added for in-place operation and just copy the
AD directly. |
| Issue summary: An OpenSSL TLS 1.3 server may fail to negotiate the expected
preferred key exchange group when its key exchange group configuration includes
the default by using the 'DEFAULT' keyword.
Impact summary: A less preferred key exchange may be used even when a more
preferred group is supported by both client and server, if the group
was not included among the client's initial predicated keyshares.
This will sometimes be the case with the new hybrid post-quantum groups,
if the client chooses to defer their use until specifically requested by
the server.
If an OpenSSL TLS 1.3 server's configuration uses the 'DEFAULT' keyword to
interpolate the built-in default group list into its own configuration, perhaps
adding or removing specific elements, then an implementation defect causes the
'DEFAULT' list to lose its 'tuple' structure, and all server-supported groups
were treated as a single sufficiently secure 'tuple', with the server not
sending a Hello Retry Request (HRR) even when a group in a more preferred tuple
was mutually supported.
As a result, the client and server might fail to negotiate a mutually supported
post-quantum key agreement group, such as 'X25519MLKEM768', if the client's
configuration results in only 'classical' groups (such as 'X25519' being the
only ones in the client's initial keyshare prediction).
OpenSSL 3.5 and later support a new syntax for selecting the most preferred TLS
1.3 key agreement group on TLS servers. The old syntax had a single 'flat'
list of groups, and treated all the supported groups as sufficiently secure.
If any of the keyshares predicted by the client were supported by the server
the most preferred among these was selected, even if other groups supported by
the client, but not included in the list of predicted keyshares would have been
more preferred, if included.
The new syntax partitions the groups into distinct 'tuples' of roughly
equivalent security. Within each tuple the most preferred group included among
the client's predicted keyshares is chosen, but if the client supports a group
from a more preferred tuple, but did not predict any corresponding keyshares,
the server will ask the client to retry the ClientHello (by issuing a Hello
Retry Request or HRR) with the most preferred mutually supported group.
The above works as expected when the server's configuration uses the built-in
default group list, or explicitly defines its own list by directly defining the
various desired groups and group 'tuples'.
No OpenSSL FIPS modules are affected by this issue, the code in question lies
outside the FIPS boundary.
OpenSSL 3.6 and 3.5 are vulnerable to this issue.
OpenSSL 3.6 users should upgrade to OpenSSL 3.6.2 once it is released.
OpenSSL 3.5 users should upgrade to OpenSSL 3.5.6 once it is released.
OpenSSL 3.4, 3.3, 3.0, 1.0.2 and 1.1.1 are not affected by this issue. |
| Issue summary: During processing of a crafted CMS EnvelopedData message
with KeyTransportRecipientInfo a NULL pointer dereference can happen.
Impact summary: Applications that process attacker-controlled CMS data may
crash before authentication or cryptographic operations occur resulting in
Denial of Service.
When a CMS EnvelopedData message that uses KeyTransportRecipientInfo with
RSA-OAEP encryption is processed, the optional parameters field of
RSA-OAEP SourceFunc algorithm identifier is examined without checking
for its presence. This results in a NULL pointer dereference if the field
is missing.
Applications and services that call CMS_decrypt() on untrusted input
(e.g., S/MIME processing or CMS-based protocols) are vulnerable.
The FIPS modules in 3.6, 3.5, 3.4, 3.3 and 3.0 are not affected by this
issue, as the affected code is outside the OpenSSL FIPS module boundary. |
