| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| Jenkins Script Security Plugin 1415.v9a_f9b_3a_c253d and earlier does not check calls from sandboxed scripts to methods added dynamically to a class at runtime, allowing attackers with permission to define and run sandboxed scripts, including Pipelines, to bypass the sandbox protection and execute code outside the sandbox. |
| The Motors WordPress plugin before 1.4.121 does not verify that a request is authorized to view a user's non-published listings before returning them, allowing unauthenticated attackers to read any author's draft, pending and private car listings - including titles, prices, media URLs and seller notes - by supplying only the target's numeric user id. |
| Jenkins Script Security Plugin 1415.v9a_f9b_3a_c253d and earlier does not check the method called through the proxy created when a sandboxed script coerces a value to an interface, if the value inherits a method of the same name as an interface method, allowing attackers with permission to define and run sandboxed scripts, including Pipelines, to bypass the sandbox protection and execute arbitrary code in the context of the Jenkins controller JVM. |
| Jenkins Script Security Plugin 1415.v9a_f9b_3a_c253d and earlier does not intercept operations performed on a null receiver (method calls, property and attribute accesses, and array accesses), allowing attackers with permission to define and run sandboxed scripts, including Pipelines, to bypass the sandbox protection and execute arbitrary code in the context of the Jenkins controller JVM. |
| In the Linux kernel, the following vulnerability has been resolved:
dmaengine: dw-edma: Initialize IRQ data before requesting IRQs
dw_edma_irq_request() passes struct dw_edma_irq to request_irq() before
dw_edma_channel_setup() fills the back pointer. A shared interrupt can
therefore enter the handler with dw_irq->dw still NULL, leading to a
NULL pointer dereference.
Set the back pointer before installing each handler. |
| In the Linux kernel, the following vulnerability has been resolved:
dma-direct: return struct page from dma_direct_alloc_from_pool()
Commit 5b138c534fda ("dma-direct: factor out a dma_direct_alloc_from_pool
helper") changed dma_direct_alloc_from_pool() to return the CPU address
from dma_alloc_from_pool(). That fits dma_direct_alloc(), but
dma_direct_alloc_pages() also uses the helper and expects a struct page *.
Fix this by making dma_direct_alloc_from_pool() return the struct page *
again, and pass the CPU address back through an out-parameter for the
dma_direct_alloc() caller. |
| Jenkins Keycloak Authentication Plugin 2.4.1 and earlier does not restrict the redirect URL after login, allowing attackers to perform phishing attacks. |
| RabbitMQ amqp091-go is a Go AMQP 0.9.1 client. Prior to 1.13.0, readField in read.go reads the length of an AMQP byte-array field with type tag x into a signed int32 and passes the value directly to make when allocating the field buffer. A malicious or compromised broker can encode a value such as 0xFFFFFFFF, which becomes -1 and causes a len out of range runtime panic. The panic escapes the network reader goroutine and terminates the client process, including during connection.start server properties or message header table parsing. This issue is fixed in version 1.13.0. |
| ScadaLTS 2.8.1-release-candidate build 0 is affected by an Authorization Bypass
Spring Security gates DWR endpoints by URL path pattern, but DWR itself dispatches method calls based on the POST body parameters c0-scriptName and c0-methodName. The crossDomainSessionSecurity setting in web.xml is set to false, which disables DWR's built-in origin validation. This means any authenticated user can invoke any DWR method (regardless of the URL-based access control) by sending their request to a URL they are permitted to access (e.g. MiscDwr.initializeLongPoll.dwr) while targeting a restricted class in the POST body.
This is the systemic root cause that enables multiple other findings to be exploited as a low privilege user. |
| A logic issue was addressed with improved checks. This issue is fixed in macOS Golden Gate 27, macOS Sequoia 15.8, macOS Tahoe 26.7. An app may be able to break out of its sandbox. |
| In the Linux kernel, the following vulnerability has been resolved:
powerpc/kexec_file: Prevent kexec range truncation
Sashiko AI review pointed out the following issue.
The __merge_memory_ranges() function incorrectly handles overlapping
memory ranges when merging them. Although sort_memory_ranges() sorts all
ranges by their start address in ascending order beforehand, the merge
logic remains defective in two ways:
1. It compares the current range's start against the previous element (i-1)
instead of the running target index (idx)
2. It unconditionally overwrites 'ranges[idx].end' with 'ranges[i].end'.
This logic flaw leads to critical memory truncation when a larger memory
range completely subsumes subsequent smaller ranges.
For example, consider a sorted input array with three ranges:
Range A (idx=0): [0x1000 - 0x9000]
Range B (i=1): [0x2000 - 0x5000] (completely inside Range A)
Range C (i=2): [0x6000 - 0x8000] (completely inside Range A)
1. When i=1 (Range B):
ranges[1].start (0x2000) <= ranges[0].end + 1 (0x9001) is TRUE.
The code executes: ranges[0].end = ranges[1].end, which erroneously
shrinks Range A's end from 0x9000 down to 0x5000.
2. When i=2 (Range C):
ranges[2].start (0x6000) <= ranges[1].end + 1 (0x5001) is FALSE.
The code falls into the else block, creating a broken new range.
As a result, valid memory fragments [0x5001 - 0x5fff] and [0x8001 - 0x9000]
are completely lost from the kexec exclude lists, potentially allowing
the crash kernel to overwrite active memory, causing data corruption
or crashes.
Fix this by ensuring the start of the current range is compared against the
end of the active merged range (idx), and use max() to safely prevent the
outer boundary from being truncated. |
| In the Linux kernel, the following vulnerability has been resolved:
LoongArch: Do not save/restore percpu base register in rethook trampoline
The rethook trampoline saves $r21 ($u0), the percpu base, into its frame
at entry and restores it at exit. Inbetween rethook_trampoline_handler()
may schedule via preempt_enable_notrace().
If the task migrates to another CPU, the frame's $r21 holds the old
CPU's percpu base, and restoring it poisons $r21 on the new CPU. Until
the next user->kernel transition heals $r21, all this_cpu_*() accesses
(runqueues, RCU per-CPU data, timer tick programming, FPU ownership)
hit the wrong CPU's percpu area.
Under kretprobe-heavy preemptible load this can corrupt scheduler and
timer state: scheduling-while-atomic splats, wrong-CPU RCU warnings,
WARN_ON_ONCE(rq != this_rq()) in nohz_balance_exit_idle(), and CPUs
parking in the idle loop with the constant timer never re-armed (hard
lockup). Reproduces on a Loongson-3A6000 with kretprobes on VFS paths
plus heavy file churn (OS install / unsquashfs).
By convention $r21 always holds the current CPU's percpu base in kernel
mode: SAVE_SOME() at exception entry reloads it only when coming from
user mode, and RESTORE_SOME() restores it only when returning to user
mode; the context-switch path never writes it. Therefore the live $r21
at trampoline exit is already correct, and nothing inbetween can change
it legitimately (kernel C code cannot write a global register variable).
The same flaw existed even in the pre-rethook kretprobe trampoline since
v6.3; it was carried over when rethook replaced it. Drop both the save
and the restore here. Drop the restore is enough to solve the issue, and
drop the save is to keep the code tidy and no need to clear it. |
| In the Linux kernel, the following vulnerability has been resolved:
mm/mempolicy: fix sleeping allocation in alloc_pages_bulk_weighted_interleave()
syzbot reported a sleeping function called from invalid context splat in
bucket_table_alloc().
When rhashtable_insert_slow() rehashes the table under rcu_read_lock(), it
calls bucket_table_alloc(..., GFP_ATOMIC | __GFP_NOWARN). If the bucket
table allocation uses vmalloc, __vmalloc_node_range_noprof() invokes
vm_area_alloc_pages() -> alloc_pages_bulk_mempolicy_noprof() with the
passed GFP_ATOMIC flags.
If the current task has an MPOL_WEIGHTED_INTERLEAVE mempolicy,
alloc_pages_bulk_weighted_interleave() is called and currently hardcodes
GFP_KERNEL when allocating the temporary weights array, triggering a
might_alloc() splat in atomic/RCU contexts.
Pass the gfp flags (masked with GFP_RECLAIM_MASK to strip page-allocator
zone modifiers like __GFP_HIGHMEM) received by
alloc_pages_bulk_weighted_interleave() to kmalloc() instead of hardcoding
GFP_KERNEL. Since the weights buffer is immediately initialized in full,
kmalloc() is sufficient. |
| In the Linux kernel, the following vulnerability has been resolved:
mm/huge_memory: transfer the pmd dirty bit to the folio on zap
zap_huge_pmd_folio() propagates the pmd young bit to the folio for the
file case, but not the dirty bit. The pte path does propagate it, in
zap_present_folio_ptes() and so does the pmd split path, in
__split_huge_pmd_locked().
For most file mappings the omission is harmless, because writing to a
shared file mapping goes through page_mkwrite(), which dirties the folio.
tmpfs is different: it has no page_mkwrite(), and vma_wants_writenotify()
is false for it, so a *read* fault on a MAP_SHARED tmpfs mapping installs
a writable pmd via do_read_fault(). do_read_fault() does not call
fault_dirty_shared_page(), so subsequent stores through that mapping set
only the hardware dirty bit in the pmd and never call folio_mark_dirty().
A shmem folio allocated by a fault is marked uptodate but not dirty (see
the clear: block in shmem_get_folio_gfp()), so PG_dirty is never set at
all.
Unmapping such a folio - munmap(), or exit_mmap() when the process dies -
then loses the only record that it was written, because zap_huge_pmd()
drops the pmd without transferring the dirty bit. Reclaim afterwards sees
a clean shmem folio: the whole swap-out block in shrink_folio_list() is
inside "if (folio_test_dirty(folio))", so pageout() is skipped and the
folio falls into __remove_mapping(). There, folio_is_file_lru() is false
for a swapbacked folio, so no shadow entry is created and
__filemap_remove_folio(folio, NULL) simply empties the i_pages slot. The
data is freed without ever being written to swap, and the next fault on
that index returns a freshly zeroed folio.
This is silent data loss for any process that keeps state in a MAP_SHARED
tmpfs segment across an unmap - for example a cache handed from one
process generation to the next through /dev/shm. It requires the folio to
be PMD-mapped, so it only shows up once shmem THP is enabled (which is
what we did in Meta fleet and started noticing crashes); with THP off the
pte path transfers the dirty bit correctly. It also only becomes visible
when swap is enabled, because with no swap device shmem folios (which are
on the anon LRU) are not scanned by reclaim at all, so the clean folio is
never dropped.
Reproduced on x86_64 with a tmpfs mounted huge=within_size: read-fault a
2MB-backed region, write a known pattern through the resulting mapping,
munmap, force reclaim of the cgroup, then re-map and read back. Without
this patch the region reads back as zeros and vmstat shows zswpout 0 - the
data was discarded rather than swapped. With this patch the region reads
back correctly and the pages are swapped out as expected. With
huge=never, or when the first touch is a write, the test passes either
way. |
| Concrete CMS before 9.5.4 re-authorized OAuth REST API requests from the bearer token alone and did not re-check the state of the account the token had been issued to. The resource server's authorization validator confirmed only that a token existed, had not expired, and had not been explicitly revoked, and deactivating a user did not revoke that user's outstanding tokens. As a result, a deactivated user retained full access to /ccm/api/1.0/* for the remaining lifetime of any token already issued to them. The same gap applied to accounts that had been deleted or locked pending a forced password reset. The Concrete CMS security team gave this vulnerability a CVSS v4.0 score of 2.0 with vector CVSS:4.0/AV:N/AC:H/AT:P/PR:L/UI:A/VC:L/VI:L/VA:N/SC:N/SI:N/SA:N. Thanks Myq Larson for reporting. |
| In the Linux kernel, the following vulnerability has been resolved:
KVM: arm64: Sign-extend VA for range-based TLBI invalidation
When the decode_range_tlbi() helper was moved to be used for S1 TLBIs,
the required sign extension was omitted. Add it.
As a result, special care must be taken to not overflow PA bits when
this is used for S2 invalidation. |
| Tanium addressed an improper access controls vulnerability in Threat Response. |
| djust provides Phoenix LiveView-style reactive server-side rendering for Django with Rust-powered performance. Prior to version 1.0.7, the WebSocket `handle_mount` and `ViewRuntime._build_request` rebuild an `HttpRequest` via `RequestFactory().get(...)` with no `HTTP_HOST`, so `request.get_host()` defaulted to `"testserver"` on the live path. Host/subdomain/domain `TenantResolver`s then misresolved the tenant — `None` on the live path while the HTTP path resolved correctly. With `STRICT_MODE=False` the tenant-scoped managers returned unscoped rows (cross-tenant disclosure); with the default they returned an empty queryset (broken tenancy). This is fixed in djust 1.0.7. The handshake Host is extracted from the ASGI scope, validated against `ALLOWED_HOSTS` (the same logic as the CSWSH Origin gate, parsed with Django's `split_domain_port` so malformed Hosts are rejected at the boundary), and propagated — with the TLS scheme — into the reconstructed request, so live-path tenant resolution matches HTTP exactly. There is no known workaround on the live path short of upgrading. Users are most exposed when combined with `STRICT_MODE=False`. |
| djust provides Phoenix LiveView-style reactive server-side rendering for Django with Rust-powered performance. Prior to version 1.0.7, SSE sessions were keyed solely by a client-chosen `session_id` with no binding to the authenticated user — a control the WebSocket transport has but that was dropped on SSE. An attacker who learns (or a victim who leaks) a `session_id` could connect to the message endpoint and dispatch event handlers that execute with the victim's identity and state. This is fixed in djust 1.0.7. Each SSE session is bound to its owning principal at creation and cross-principal access is rejected; SSE session creation is additionally capped per principal. As a workaround, disable the SSE transport. |
| vm2 versions 3.11.4 through 3.11.6 incompletely filter Node.js registered internal symbols across the sandbox boundary. The extraction filters in lib/setup-sandbox.js and the cross-realm symbol checks and write traps in lib/bridge.js use a fixed list of known dangerous registered symbols that omits nodejs.stream.disturbed and nodejs.stream.errored, which are exposed on host WebStream prototypes on newer Node.js releases (validated on Node.js v25.8.0). When the embedder exposes a host WebStream object and the host stream/web module to the sandbox, sandbox code can obtain the real host symbols via Object.getOwnPropertySymbols(streamWeb.ReadableStream.prototype) and use them as write keys on host stream objects, corrupting host-visible stream state — for example making stream.Readable.isDisturbed() return false for an already-consumed stream. This can bypass host logic that relies on Node's public stream-state helpers to enforce one-shot body consumption, reject errored streams, or decide whether a stream is safe to hand to another component. It is not a host code-execution primitive in the reported proof of vulnerability. This is an incomplete fix for the earlier nodejs.* symbol filtering issue. Fixed in vm2 3.11.7. |
