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• Pretty URL in ADF Faces of JDeveloper 11.1.2.2

  - by Frank Nimphius

  Many features planned for Oracle JDeveloper 12c find their way into current releases of Oracle JDeveloper 11g R1 and JDeveloper 11g R2. One example of such a feature is "pretty URL" - or "clean URL" as the Oracle JDeveloper 11g R2 (11.1.2.2) documentation puts it. "A.2.3.24 Clean URLs Historically, ADF Faces has used URL parameters to hold information, such as window IDs and state. However, URL parameters can prevent search engines from recognizing when URLs are actually the same, and therefore interfere with analytics. URL parameters can also interfere with bookmarking. By default, ADF Faces removes URL parameters using the HTML5 History Management API. If that API is unavailable, then session cookies are used.You can also manually configure how URL parameters are removed using the context parameter oracle.adf.view.rich.prettyURL.OPTIONS. Set the parameter to off so that no parameters are removed. Set the parameter to useHistoryApi to only use the HTML5 History Management API. If a browser does not support this API, then no parameters will be removed. Set the parameter to useCookies to use session cookies to remove parameters. If the browser does not support cookies, then no parameters will be removed." See: http://docs.oracle.com/cd/E26098_01/web.1112/e16181/ap_config.htm#ADFUI12856 So basically, what this part in the documentation says is: In JDeveloper 11g R2 (11.1.2.2), Oracle ADF Faces automatically removes its internally used dynamic parameters from the URL You can influence the setting with the prettyURL.OPTIONS context option, which however is not recommended you to do because the default behavior is able to detect if the browser client supports HTML 5 History management or not. In the latter case it the uses a session cookie and if this doesn't work, falls back to the "old" URL parameter adding. The information that is not so explicit and clearly mentioned in the documentation is that this is only for ADF Faces parameters (such as _afrLoop, Adf-Window-Id, etc.), but not the ADF controller token (_adf.ctrl-state)! Removing the ADF controller token is an enhancement request that will be implemented in Oracle JDeveloper 12c

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• Gauging Maturity of your BPM Strategy - part 1 / 2

  - by Sanjeev Sharma

  Normal 0 false false false EN-US X-NONE X-NONE MicrosoftInternetExplorer4 /* Style Definitions */ table.MsoNormalTable {mso-style-name:"Table Normal"; mso-tstyle-rowband-size:0; mso-tstyle-colband-size:0; mso-style-noshow:yes; mso-style-priority:99; mso-style-qformat:yes; mso-style-parent:""; mso-padding-alt:0in 5.4pt 0in 5.4pt; mso-para-margin:0in; mso-para-margin-bottom:.0001pt; mso-pagination:widow-orphan; font-size:10.0pt; font-family:"Times New Roman","serif";} In this post I will discuss the essence of maturity assessment and the business imperative for doing the same in the context of BPM. Social psychology purports that an individual progresses from being a beginner to an expert in a given activity or task along four stages of self-awareness: Unconscious Incompetence where the individual does not understand or know how to do something and does not necessarily recognize the deficit and may even deny the usefulness of the skill. Conscious Incompetence where the individual recognizes the deficit, as well as the value of a new skill in addressing the deficit. Conscious Competence where the individual understands or knows how to do something but demonstrating the skill requires explicit concentration. Unconscious Competence where the individual has had so much practice with a skill that it has become "second nature" and serves as a basis of developing other complementary skills. We can extend the above thinking to an organization as a whole by measuring an organization’s level of competence in a specific area or capability, as an aggregate of the competence levels of individuals it is comprised of. After all organizations too like individuals, evolve through experience, develop “memory” and capabilities that are shaped through a constant cycle of learning, un-learning and re-learning. Hence the key to organizational success lies in developing these capabilities to enable execution of its strategy in-line with the external environment i.e. demand, competition, economy etc. However developing a capability merits establishing a base line in order to Assess the magnitude of improvement from past investments Identify gaps and short-comings Prioritize future investments in the right areas A maturity assessment is essentially an organizational self-awareness check that is aimed at depicting the “as-is” snapshot of an existing capability in-order to guide future investments to develop that capability in-line with business goals. This effectively is the essence of a maturity Organizational capabilities stem through its architecture, routines, culture and intellectual resources that are implicitly and explicitly embedded in its business processes. Given that business processes underpin realization of organizational capabilities, is what has prompted business transformation and process management efforts. Thus, the BPM capability of an organization needs to be measured on an on-going basis to ensure delivery of its planned benefits. In my next post I will describe Oracle’s BPM Maturity assessment methodology.

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• Reporting on common code smells : A POC

  - by Dave Ballantyne

  Over the past few blog entries, I’ve been looking at parsing TSQL scripts in a variety of ways for a variety of tasks.  In my last entry ‘How to prevent ‘Select *’ : The elegant way’, I looked at parsing SQL to report upon uses of SELECT *.  The obvious question leading on from this is, “Great, what about other code smells ?”  Well, using the language service parser to do that was turning out to be a bit of a hard job,  sure I was getting tokens but no real context.  I wasn't even being told when an end of statement had been reached. One of the other parsing options available from Microsoft is exposed in the assembly ‘Microsoft.SqlServer.TransactSql.ScriptDom’,  this is ,I believe, installed with the client development tools with SQLServer.  It is much more feature rich than the original parser I had used and breaks a TSQL script into intuitive classes for analysis. So, what sort of smells can I now find using it ?  Well, for an opening gambit quite a nice little list. Use of NOLOCK Set of READ UNCOMMITTED Use of SELECT * Insert without column references Explicit datatype conversion on Sargs Cross server selects Non use of two-part naming convention Table and Query hint usage Changes in set options Use of single line comments Use of ordinal column positions in ORDER BY clause Now, lets not argue the point that “It depends” as smells on some of these, but as an academic exercise it is quite interesting.  The code is available from this link :https://www.dropbox.com/s/rfk32sou4fzl2cw/TSQLDomTest.zip  All the usual disclaimers apply to this code, I cannot be held responsible for anything ranging from mild annoyance through to universe destruction due to the use of this code or examples. The zip file contains a powershell script and my test cases.  The assembly used requires .Net 4 to run, which means that you will need powershell 3 ( though im running through PowerGUI and all works ok ) .  The code searches for all .sql files in the folder hierarchy for the workingpath,  you can override this if you want by simply changing the $Folder variable, and processes each in turn for the smells.  Feedback is not great at the moment, all it does is output to an xml file (Smells.xml) the offset position and a description of the smell found. Right now, I am interested in your feedback.  What do you think ?  Is this (or should it be) more than an academic exercise ?  Can tooling such as this be used as some form of code quality measure ?  Does it Work ? Do you have a case listed above which is not being reported ? Do you have a case that you would love to be reported ? Let me know , please mailto: [email protected]. Thanks

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• Why enumerator structs are a really bad idea (redux)

  - by Simon Cooper

  My previous blog post went into some detail as to why calling MoveNext on a BCL generic collection enumerator didn't quite do what you thought it would. This post covers the Reset method. To recap, here's the simple wrapper around a linked list enumerator struct from my previous post (minus the readonly on the enumerator variable): sealed class EnumeratorWrapper : IEnumerator<int> { private LinkedList<int>.Enumerator m_Enumerator; public EnumeratorWrapper(LinkedList<int> linkedList) { m_Enumerator = linkedList.GetEnumerator(); } public int Current { get { return m_Enumerator.Current; } } object System.Collections.IEnumerator.Current { get { return Current; } } public bool MoveNext() { return m_Enumerator.MoveNext(); } public void Reset() { ((System.Collections.IEnumerator)m_Enumerator).Reset(); } public void Dispose() { m_Enumerator.Dispose(); } } If you have a look at the Reset method, you'll notice I'm having to cast to IEnumerator to be able to call Reset on m_Enumerator. This is because the implementation of LinkedList<int>.Enumerator.Reset, and indeed of all the other Reset methods on the BCL generic collection enumerators, is an explicit interface implementation. However, IEnumerator is a reference type. LinkedList<int>.Enumerator is a value type. That means, in order to call the reset method at all, the enumerator has to be boxed. And the IL confirms this: .method public hidebysig newslot virtual final instance void Reset() cil managed { .maxstack 8 L_0000: nop L_0001: ldarg.0 L_0002: ldfld valuetype [System]System.Collections.Generic.LinkedList`1/Enumerator<int32> EnumeratorWrapper::m_Enumerator L_0007: box [System]System.Collections.Generic.LinkedList`1/Enumerator<int32> L_000c: callvirt instance void [mscorlib]System.Collections.IEnumerator::Reset() L_0011: nop L_0012: ret } On line 0007, we're doing a box operation, which copies the enumerator to a reference object on the heap, then on line 000c calling Reset on this boxed object. So m_Enumerator in the wrapper class is not modified by the call the Reset. And this is the only way to call the Reset method on this variable (without using reflection). Therefore, the only way that the collection enumerator struct can be used safely is to store them as a boxed IEnumerator<T>, and not use them as value types at all.

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• What is a good strategy for binding view objects to model objects in C++?

  - by B.J.

  Imagine I have a rich data model that is represented by a hierarchy of objects. I also have a view hierarchy with views that can extract required data from model objects and display the data (and allow the user to manipulate the data). Actually, there could be multiple view hierarchies that can represent and manipulate the model (e.g. an overview-detail view and a direct manipulation view). My current approach for this is for the controller layer to store a reference to the underlying model object in the View object. The view object can then get the current data from the model for display, and can send the model object messages to update the data. View objects are effectively observers of the model objects and the model objects broadcast notifications when properties change. This approach allows all the views to update simultaneously when any view changes the model. Implemented carefully, this all works. However, it does require a lot of work to ensure that no view or model objects hold any stale references to model objects. The user can delete model objects or sub-hierarchies of the model at any time. Ensuring that all the view objects that hold references to the model objects that have been deleted is time-consuming and difficult. It feels like the approach I have been taking is not especially clean; while I don't want to have to have explicit code in the controller layer for mediating the communication between the views and the model, it seems like there must be a better (implicit) approach for establishing bindings between the view and the model and between related model objects. In particular, I am looking for an approach (in C++) that understands two key points: There is a many to one relationship between view and model objects If the underlying model object is destroyed, all the dependent view objects must be cleaned up so that no stale references exist While shared_ptr and weak_ptr can be used to manage the lifetimes of the underlying model objects and allows for weak references from the view to the model, they don't provide for notification of the destruction of the underlying object (they do in the sense that the use of a stale weak_ptr allows for notification), but I need an approach that notifies the dependent objects that their weak reference is going away. Can anyone suggest a good strategy to manage this?

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• How to force a clock update using ntp?

  - by ysap

  I am running Ubuntu on an ARM based embedded system that lacks a battery backed RTC. The wake-up time is somewhere during 1970. Thus, I use the NTP service to update the time to the current time. I added the following line to /etc/rc.local file: sudo ntpdate -s time.nist.gov However, after startup, it still takes a couple of minutes until the time is updated, during which period I cannot work effectively with tar and make. How can I force a clock update at any given time? UPDATE 1: The following (thanks to Eric and Stephan) works fine from command line, but fails to update the clock when put in /etc/rc.local: $ date ; sudo service ntp stop ; sudo ntpdate -s time.nist.gov ; sudo service ntp start ; date Thu Jan 1 00:00:58 UTC 1970 * Stopping NTP server ntpd [ OK ] * Starting NTP server [ OK ] Thu Feb 14 18:52:21 UTC 2013 What am I doing wrong? UPDATE 2: I tried following the few suggestions that came in response to the 1st update, but nothing seems to actually do the job as required. Here's what I tried: Replace the server to us.pool.ntp.org Use explicit paths to the programs Remove the ntp service altogether and leave just sudo ntpdate ... in rc.local Remove the sudo from the above command in rc.local Using the above, the machine still starts at 1970. However, when doing this from command line once logged in (via ssh), the clock gets updated as soon as I invoke ntpdate. Last thing I did was to remove that from rc.local and place a call to ntpdate in my .bashrc file. This does update the clock as expected, and I get the true current time once the command prompt is available. However, this means that if the machine is turned on and no user is logged in, then the time never gets updates. I can, of course, reinstall the ntp service so at least the clock is updated within a few minutes from startup, but then we're back at square 1. So, is there a reason why placing the ntpdate command in rc.local does not perform the required task, while doing so in .bashrc works fine?

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• Client-Server connection response timeout issues

  - by Srikar

  User creates a folder in client and in the client-side code I hit an API to the server to make this persistent for that user. But in some cases, my server is so busy that the request timesout. The server has executed my request but timedout before sending a response back to client. The timeout set is 10 seconds in client. At this point the client thinks that server has not executed its request (of creating a folder) and ends up sending it again. Now I have 2 folders on the server but the user has created only 1 folder in the client. How to prevent this? One of the ways to solve this is to use a unique ID with each new request. So the ID acts as a distinguisher between old and new requests from client. But this leads to storing these IDs on my server and do a lookup for each API call which I want to avoid. Other way is to increase the timeout duration. But I dont want to change this from 10 seconds. Something tells me that there are better solutions. I have posted this question in stackoverflow but I think its better suited here. UPDATE: I will make my problem even more explicit. The client is a webbrowser and the server is running nginx+django+mysql (standard stack). The user creates a folder in webbrowser. As a result I need to hit a server API. The API call responds back, thereby client knows API call was success. This is normal scenario. Sometimes though, server successfully completes the API request but the client-side (webbrowser) connection timesout before server can respond back. The client has no clue at this point. The user thinks the request was a fail & clicks again. This time it was a success but when the UI refreshes he sees 2 folders. I want to remedy this situation.

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• How to perform Cross Join with Linq

  - by berthin

  Cross join consists to perform a Cartesian product of two sets or sequences. The following example shows a simple Cartesian product of the sets A and B: A (a1, a2) B (b1, b2) => C (a1 b1,            a1 b2,            a2 b1,            a2, b2 ) is the Cartesian product's result. Linq to Sql allows using Cross join operations. Cross join is not equijoin, means that no predicate expression of equality in the Join clause of the query. To define a cross join query, you can use multiple from clauses. Note that there's no explicit operator for the cross join. In the following example, the query must join a sequence of Product with a sequence of Pricing Rules: 1: //Fill the data source 2: var products = new List<Product> 3: { 4: new Product{ProductID="P01",ProductName="Amaryl"}, 5: new Product {ProductID="P02", ProductName="acetaminophen"} 6: }; 7:  8: var pricingRules = new List<PricingRule> 9: { 10: new PricingRule {RuleID="R_1", RuleType="Free goods"}, 11: new PricingRule {RuleID="R_2", RuleType="Discount"}, 12: new PricingRule {RuleID="R_3", RuleType="Discount"} 13: }; 14: 15: //cross join query 16: var crossJoin = from p in products 17: from r in pricingRules 18: select new { ProductID = p.ProductID, RuleID = r.RuleID };   Below the definition of the two entities using in the above example.   1: public class Product 2: { 3: public string ProductID { get; set; } 4: public string ProductName { get; set; } 5: } 1: public class PricingRule 2: { 3: public string RuleID { get; set; } 4: public string RuleType { get; set; } 5: }   Doing this: 1: foreach (var result in crossJoin) 2: { 3: Console.WriteLine("({0} , {1})", result.ProductID, result.RuleID); 4: }   The output should be similar on this:   ( P01   -    R_1 )   ( P01   -    R_2 )   ( P01   -    R_3 )   ( P02   -    R_1 )   ( P02   -    R_2 )   ( P02   -    R_3) Conclusion Cross join operation is useful when performing a Cartesian product of two sequences object. However, it can produce very large result sets that may caused a problem of performance. So use with precautions :)

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• Java @Contented annotation to help reduce false sharing

  - by Dave

  See this posting by Aleksey Shipilev for details -- @Contended is something we've wanted for a long time. The JVM provides automatic layout and placement of fields. Usually it'll (a) sort fields by descending size to improve footprint, and (b) pack reference fields so the garbage collector can process a contiguous run of reference fields when tracing. @Contended gives the program a way to provide more explicit guidance with respect to concurrency and false sharing. Using this facility we can sequester hot frequently written shared fields away from other mostly read-only or cold fields. The simple rule is that read-sharing is cheap, and write-sharing is very expensive. We can also pack fields together that tend to be written together by the same thread at about the same time. More generally, we're trying to influence relative field placement to minimize coherency misses. Fields that are accessed closely together in time should be placed proximally in space to promote cache locality. That is, temporal locality should condition spatial locality. Fields accessed together in time should be nearby in space. That having been said, we have to be careful to avoid false sharing and excessive invalidation from coherence traffic. As such, we try to cluster or otherwise sequester fields that tend to written at approximately the same time by the same thread onto the same cache line. Note that there's a tension at play: if we try too hard to minimize single-threaded capacity misses then we can end up with excessive coherency misses running in a parallel environment. Theres no single optimal layout for both single-thread and multithreaded environments. And the ideal layout problem itself is NP-hard. Ideally, a JVM would employ hardware monitoring facilities to detect sharing behavior and change the layout on the fly. That's a bit difficult as we don't yet have the right plumbing to provide efficient and expedient information to the JVM. Hint: we need to disintermediate the OS and hypervisor. Another challenge is that raw field offsets are used in the unsafe facility, so we'd need to address that issue, possibly with an extra level of indirection. Finally, I'd like to be able to pack final fields together as well, as those are known to be read-only.

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• What are different ways to reduce latency between a server and a web application? [closed]

  - by jjoensuu

  this is a question about a web application that provides SOAP web services. For the sake of this question, this web app is hosted on a server SERVER B which is located in California. We have an automated, scheduled, process running on a server SERVER A, located in New York. This scheduled process is supposed to send SOAP messages to SERVER B every so often, but this process typically dies soon after starting. We have now been told by the vendor that reason why the process dies is because of the latency between SERVER A and SERVER B. The data traffic is routed through many diffent public networks. There is no dedicated line between SERVER A and SERVER B. As a result I have been asked to look into ways to reduce the latency between SERVER A and SERVER B. So I wanted to ask, what are the different ways to reduce latency in a situation like this? For example, would it help to switch from HTTPS to some other secure protocol? (the thought here is that perhaps some other alternative would require fewer handshakes than HTTPS). Or would a VPN help? If a VPN would reduce the latency, how would it do that? NOTE: I am not looking for an explicit answer that would work in my specific situation. I am more like looking just for a simple list of what technologies could be used for this. I will still have to evaluate the technologies and discuss them internally with others, so the list would just be a starting point. Here I am assuming that there exists very few ways to reduce latency between two servers that communicate across public networks using HTTPS. Feel free to correct me if this assumption is wrong and please ask if there is a need for specific information. NOTE 2: A list of technologies is a specific answer to the question I stated in the title. NOTE 3: Its rather dumb to close this question when it is after all about me looking for information and furthermore this information can clearly be useful for others. Anyway luckily there are other sites where I can ask around. StackExchange seems to attached to their own philosophical principles. Many thanks

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• Are separate business objects needed when persistent data can be stored in a usable format?

  - by Kylotan

  I have a system where data is stored in a persistent store and read by a server application. Some of this data is only ever seen by the server, but some of it is passed through unaltered to clients. So, there is a big temptation to persist data - whether whole rows/documents or individual fields/sub-documents - in the exact form that the client can use (eg. JSON), as this removes various layers of boilerplate, whether in the form of procedural SQL, an ORM, or any proxy structure which exists just to hold the values before having to re-encode them into a client-suitable form. This form can usually be used on the server too, though business logic may have to live outside of the object, On the other hand, this approach ends up leaking implementation details everywhere. 9 times out of 10 I'm happy just to read a JSON structure out of the DB and send it to the client, but 1 in every 10 times I have to know the details of that implicit structure (and be able to refactor access to it if the stored data ever changes). And this makes me think that maybe I should be pulling this data into separate business objects, so that business logic doesn't have to change when the data schema does. (Though you could argue this just moves the problem rather than solves it.) There is a complicating factor in that our data schema is constantly changing rapidly, to the point where we dropped our previous ORM/RDBMS system in favour of MongoDB and an implicit schema which was much easier to work with. So far I've not decided whether the rapid schema changes make me wish for separate business objects (so that server-side calculations need less refactoring, since all changes are restricted to the persistence layer) or for no separate business objects (because every change to the schema requires the business objects to change to stay in sync, even if the new sub-object or field is never used on the server except to pass verbatim to a client). So my question is whether it is sensible to store objects in the form they are usually going to be used, or if it's better to copy them into intermediate business objects to insulate both sides from each other (even when that isn't strictly necessary)? And I'd like to hear from anybody else who has had experience of a similar situation, perhaps choosing to persist XML or JSON instead of having an explicit schema which has to be assembled into a client format each time.

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• "Whole-team" C++ features?

  - by Blaisorblade

  In C++, features like exceptions impact your whole program: you can either disable them in your whole program, or you need to deal with them throughout your code. As a famous article on C++ Report puts it: Counter-intuitively, the hard part of coding exceptions is not the explicit throws and catches. The really hard part of using exceptions is to write all the intervening code in such a way that an arbitrary exception can propagate from its throw site to its handler, arriving safely and without damaging other parts of the program along the way. Since even new throws exceptions, every function needs to provide basic exception safety — unless it only calls functions which guarantee throwing no exception — unless you disable exceptions altogether in your whole project. Hence, exceptions are a "whole-program" or "whole-team" feature, since they must be understood by everybody in a team using them. But not all C++ features are like that, as far as I know. A possible example is that if I don't get templates but I do not use them, I will still be able to write correct C++ — or will I not?. I can even call sort on an array of integers and enjoy its amazing speed advantage wrt. C's qsort (because no function pointer is called), without risking bugs — or not? It seems templates are not "whole-team". Are there other C++ features which impact code not directly using them, and are hence "whole-team"? I am especially interested in features not present in C. Update: I'm especially looking for features where there's no language-enforced sign you need to be aware of them. The first answer I got mentioned const-correctness, which is also whole-team, hence everybody needs to learn about it; however, AFAICS it will impact you only if you call a function which is marked const, and the compiler will prevent you from calling it on non-const objects, so you get something to google for. With exceptions, you don't even get that; moreover, they're always used as soon as you use new, hence exceptions are more "insidious". Since I can't phrase this as objectively, though, I will appreciate any whole-team feature. Appendix: Why this question is objective (if you wonder) C++ is a complex language, so many projects or coding guides try to select "simple" C++ features, and many people try to include or exclude some ones according to mostly subjective criteria. Questions about that get rightfully closed regularly here on SO. Above, instead, I defined (as precisely as possible) what a "whole-team" language feature is, provide an example (exceptions), together with extensive supporting evidence in the literature about C++, and ask for whole-team features in C++ beyond exceptions. Whether you should use "whole-team" features, or whether that's a relevant concept, might be subjective — but that only means the importance of this question is subjective, like always.

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• Physics Engine [Collision Response, 2-dimensional] experts, help!! My stack is unstable!

  - by Register Sole

  Previously, I struggle with the sequential impulse-based method I developed. Thanks to jedediah referring me to this paper, I managed to rebuild the codes and implement the simultaneous impulse based method with Projected-Gauss-Seidel (PGS) iterative solver as described by Erin Catto (mentioned in the reference of the paper as [Catt05]). So here's how it currently is: The simulation handles 2-dimensional rotating convex polygons. Detection is using separating-axis test, with a SKIN, meaning closest points between two polygons is detected and determined if their distance is less than SKIN. To resolve collision, simultaneous impulse-based method is used. It is solved using iterative solver (PGS-solver) as in Erin Catto's paper. Error-correction is implemented using Baumgarte's stabilization (you can refer to either paper for this) using J V = beta/dt*overlap, J is the Jacobian for the constraints, V the matrix containing the velocities of the bodies, beta an error-correction parameter that is better be < 1, dt the time-step taken by the engine, and overlap, the overlap between the bodies (true overlap, so SKIN is ignored). However, it is still less stable than I expected :s I tried to stack hexagons (or squares, doesn't really matter), and even with only 4 to 5 of them, they hardly stand still! Also note that I am not looking for a sleeping scheme. But I would settle if you have any explicit scheme to handle resting contacts. That said, I would be more than happy if you have a way of treating it generally (as continuous collision, instead of explicitly as a special state). Ideas I have: I would try adding a damping term (proportional to velocity) to the Baumgarte. Is this a good idea in general? If not I would not want to waste my time trying to tune the parameter hoping it magically works. Ideas I have tried: Using simultaneous position based error correction as described in the paper in section 5.3.2, turned out to be worse than the current scheme. If you want to know the parameters I used: Hexagons, side 50 (pixels) gravity 2400 (pixels/sec^2) time-step 1/60 (sec) beta 0.1 restitution 0 to 0.2 coeff. of friction 0.2 PGS iteration 10 initial separation 10 (pixels) mass 1 (unit is irrelevant for now, i modified velocity directly<-impulse method) inertia 1/1000 Thanks in advance! I really appreciate any help from you guys!! :)

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• Can a CNAME be a hostname

  - by pulegium

  This is bit of a theological question, but nonetheless... So, a server has a hostname, let's say the fqdn is hostname.example.com (to be really precise about what I mean, this is the name that is set in /etc/sysconfig/network). The very same server has multiple interfaces on different subnets. Let's say the IPs are 10.0.0.1 and 10.0.1.1. Now the question is, is it theoretically (mind you, this is important, I know that practically it works, but I'm interested in purely academic answer) allowed to have the following setup: interface1.example.com. IN A 10.0.0.1 interface2.example.com. IN A 10.0.1.1 hostname.example.com. IN CNAME interface1.example.com. OR should it rather be: hostname.example.com. IN A 10.0.0.1 interface2.example.com. IN A 10.0.1.1 interface1.example.com. IN CNAME hostname.example.com. I guess it's obvious which one is making more sense from the management/administration POV, but is it technically correct? The argument against the first setup is that a reverse lookup to 10.0.0.1 returns interface1.example.com and not what one might expect (ie the hostname: hostname.example.com), so the forward request and then sub sequential reverse lookups would return different results. Now, as I said, I want a theoretical answer. Links to RFC sections etc, that explicitly allows or disallows use of CNAME name as a hostname. If there's none, that's fine too, I just need to confirm. I failed to find any explicit statements so far, bar this book, where this situation is given as an example and implies that it can be done as one of the ways to avoid MX records pointing to a CNAME.

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• Kate gives out debug messages on the console from which it is started

  - by Elan

  I am new to Linux. I use Ubuntu 11.04. Whenever I open a file with kate from the commandline, with 'kate &' (or without ampersand), Kate starts out giving messages on the console. It continuously gives them out as I save a file or close one. They look like debug messages to me (sample below). I have used Synaptic package manager to install Kate. Uninstalling and installing the dev version did not make any change. Soon my console becomes cluttered. Is there a way to suppress these messages? There was nothing explicit in Kate settings either. Thank you, The messages look like kate(13412)/kate-filetree KateFileTreeModel::handleInsert: BEGIN! kate(13412)/kate-filetree KateFileTreeModel::handleInsert: creating a new root kate(13412)/kate-filetree ProxyItem::ProxyItem: ProxyItem(0x1796840,0x0,-1,QObject(0x0) .... kate(13435)/kate-filetree KateFileTreeModel::documentActivated: adding viewHistory ProxyItem(0x1eb7cf0,0x1eb6830,0,KateDocument(0x1d93ea0) , "Untitled" ) kate(13435)/kate-filetree KateFileTreeModel::updateBackgrounds: BEGIN! kate(13435)/kate-filetree KateFileTreeModel::updateBackgrounds: END! kate(13435)/kate-filetree KateFileTreeModel::documentActivated: END! kate(13435)/kate-filetree KateFileTreePluginView::viewChanged: END! X Error: BadWindow (invalid Window parameter) 3 Major opcode: 20 (X_GetProperty) Resource id: 0x5601b42 X Error: BadWindow (invalid Window parameter) 3 Major opcode: 20 (X_GetProperty) Resource id: 0x5601b42

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• glib2 64-bit compile fails on Solaris 10

  - by Aaron

  I'm encountering a problem building glib-2.26.1 on a Solaris 10 box - 64-bit. Goo diligence doesn't turn anything up, but no matter what I do the build fails in the same way. I've tried using the Sun Studio compiler, gcc (SFW) to no avail. When I compile I get the following error: [root@foo glib-2.26.1]$ export CC=/opt/solstudio12.2/bin/cc [root@foo glib-2.26.1]$ export CFLAGS="-m64" ...configure goes normally... [root@foo glib-2.26.1]$ make ...snip... source='gatomic.c' object='gatomic.lo' libtool=yes \ DEPDIR=.deps depmode=none /bin/bash ../depcomp \ /bin/bash ../libtool --tag=CC --mode=compile /opt/solstudio12.2/bin/cc -DHAVE_CONFIG_H -I. -I.. -I.. -I../glib -I../glib -I.. -DG_LOG_DOMAIN=\"GLib\" -DG_DISABLE_CAST_CHECKS -DG_DISABLE_DEPRECATED -DGLIB_COMPILATION -DPCRE_STATIC -DG_DISABLE_SINGLE_INCLUDES -D_REENTRANT -D_PTHREADS -m64 -c -o gatomic.lo gatomic.c libtool: compile: /opt/solstudio12.2/bin/cc -DHAVE_CONFIG_H -I. -I.. -I.. -I../glib -I../glib -I.. -DG_LOG_DOMAIN=\"GLib\" -DG_DISABLE_CAST_CHECKS -DG_DISABLE_DEPRECATED -DGLIB_COMPILATION -DPCRE_STATIC -DG_DISABLE_SINGLE_INCLUDES -D_REENTRANT -D_PTHREADS -m64 -c gatomic.c -KPIC -DPIC -o .libs/gatomic.o "gatomic.c", line 885: warning: no explicit type given "gatomic.c", line 885: syntax error before or at: * "gatomic.c", line 885: warning: old-style declaration or incorrect type for: g_atomic_mutex "gatomic.c", line 906: warning: implicit function declaration: g_mutex_lock "gatomic.c", line 909: warning: implicit function declaration: g_mutex_unlock "gatomic.c", line 1155: warning: implicit function declaration: g_mutex_new "gatomic.c", line 1155: warning: improper pointer/integer combination: op "=" cc: acomp failed for gatomic.c make[4]: *** [gatomic.lo] Error 1 make[4]: Leaving directory `/root/glib-2.26.1/glib' make[3]: *** [all-recursive] Error 1 make[3]: Leaving directory `/root/glib-2.26.1/glib' make[2]: *** [all] Error 2 make[2]: Leaving directory `/root/glib-2.26.1/glib' make[1]: *** [all-recursive] Error 1 make[1]: Leaving directory `/root/glib-2.26.1' make: *** [all] Error 2 Does anyone know where the build might be going wrong? Not sure where else to look here. Thanks.

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• Adding network share as the system account breaks Win7 backup to network

  - by ChrisBenn

  (On Win7 Ultimate x64 SP1) So I've been using Win7 backup to \192.168.0.100\Backup\main-desktop\ for awhile without issue. Yesterday I tried to setup crashplan to synchronize my dropbox folder and a network share. I then found out that crashplan, as it runs under the system account, can't see my user mapped drives. So I created a startup script net use O: \192.168.0.100\Documents /USER:192.168.0.100\username password and set it to run, on startup, after the network interface is up, as the system account. (the username & password are the same for the net use script above, the locally logged in user, and the explicit username/password entered in windows backup). I woke up this morning to find error flags from the windows backup and get "Network location cannot be used" (0x800704B3). If I disable the startup task & reboot then windows backup works fine. I'm not sure why having a mapped drive for another user is killing windows backup (same server, different folder). I can work around the issue by using another program to synchronize the two folders, but I'm completely in the dark as to why this happens (and it's 100% repeatable). Uninstalling the crashplan client doesn't change anything - it's the net use run under the system account that breaks win7 backup (to a network location).

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• Nginx try_files or else continue matching against locations?

  - by Yang

  I'm wondering whether this is possible with Nginx: I just added a directory with a bunch of HTML files (foo.html, bar.html) that I'd like to serve with /foo, /bar, etc. If the URL doesn't match up with a file name I'd like to fall back to whatever the next best matching location would be. So I have: # This block is newly added. location ~ ^/([^/]+)$ { default_type text/html; alias /blah/$1.html; } # Our long list of existing subsystems below.... location /subscribe { proxy_pass http://127.0.0.1:5000; } location /upload { proxy_pass http://127.0.0.1:8090; proxy_read_timeout 99999; } location ~ /(data|garbage|blargh).* { proxy_pass http://127.0.0.1:8090; proxy_read_timeout 99999; auth_basic text; auth_basic_user_file /etc/nginx/htpasswd; } .... The problem is that the first regex now eats up the URLs that would've gone to other locations, as per the documented behavior of location. One approach is to maintain the full explicit list of files in the first location block, but this list is quite large and is always changing. Is there a way to check to see if the file exists first, and if not, then continue with what would've been the next-best location match? I took stabs using try_files (including using a @fallback and nesting locations in there) but I don't think it's capable of doing this. However I thought I'd ask here in case I'm missing something. (Or maybe there's another better approach altogether.)

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• IIS 404 custom error

  - by Greg B

  I've deployed an ASP.NET 3.5 app to a 64bit Windows 2003 R2 server. In the web.config I have the following <customErrors mode="RemoteOnly" defaultRedirect="/404/"> <error statusCode="404" redirect="/404/"/> <error statusCode="500" redirect="/500/"/> </customErrors> In the website properties in IIS Manager I have set the 404 and 500 errors to Type = "URL" and the same URLs as in the web.config. I have a wildcard application map to the .NET 2.0 aspnet_isapi.dll with "Verify file exists" turned off. If I try to hit a fake .aspx file I successfully get sent to the 404 page. I belive this is because there is an explicit mapping for .aspx to the .NET DLL. If I try to access a fake directory I simply recieve a plain text response saying: The system cannot find the file specified. It would appear that these requests for directories are not being routed through the .NET pipeline, which is what I would expect (and need) to happen becuase of the wildcard application mapping. Any ideas?

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• vmware vcenter 5.1 installation with FQDN error

  - by CSG

  I'm trying to install vCenter 5.1 on a windows 2012 dedicated (with SQL express standalone) During the installation of the Single Sign On module i've a warning "the fully qualified domain name cannot be resolved with nslookup. if you continue the installation some features might not work correctly. for detailed requiments see the installation and setup guide" The only indication that i've found are about the reverse zone dns resolution.. and this works! i've verified that the dns works properly with nslookup C:\Users\admin>nslookup srv6.mydomain.local Server: srv2.mydomain.local Address: 172.25.4.22 Nome: srv6.mydomain.local Address: 172.25.1.26 C:\Users\admin>nslookup 172.25.1.26 Server: srv2.mydomain.local Address: 172.25.4.22 Nome: srv6.mydomain.local Address: 172.25.1.26 (all ip are right: I've the vCenter=srv6 and DC+DNS=srv2 on different vlan) i've tryed to force the resolution of the ip changing the [..]\drivers\etc\hosts file i've disabled the IPv6 support i've used all combination with domain prefixes (explicit, by dhcp, undefined..) i've disabled all antivirus/firewall (kaspersky end point 10) is this a bug of vcenter 5.1.0-1065152 ? have you got any suggestions for me?

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• Unable to connect to FTP server using Filezilla with router in-between

  - by pkswatch

  While connecting to my web server using filezilla, i am getting this error: Status: Resolving address of ftp.mysite.org.in Status: Connecting to 199.199.199.18:21... Status: Connection established, waiting for welcome message... Response: 220---------- Welcome to Pure-FTPd [privsep] [TLS] ---------- Response: 220-You are user number 1 of 150 allowed. Response: 220-Local time is now 17:58. Server port: 21. Response: 220-This is a private system - No anonymous login Response: 220-IPv6 connections are also welcome on this server. Response: 220 You will be disconnected after 5 minutes of inactivity. Command: AUTH TLS Response: 234 AUTH TLS OK. Status: Initializing TLS... Error: GnuTLS error -9: A TLS packet with unexpected length was received. Status: Server did not properly shut down TLS connection Error: Could not connect to server I use a cradlepoint CTR35 wifi router to connect to the wired internet connection. When i connect to the same server without this router, the connection works flawlessly. So i guess there is some problem with my router firewall settings, but i dont know what! Can somebody help me out please? Note: The server requires EXPLICIT FTP OVER TLS and does not work with plain FTP sessions. And i can connect to other servers using plain FTP with the router in between.

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• Surprising corruption and never-ending fsck after resizing a filesystem.

  - by Steve Kemp

  System in question has Debian Lenny installed, running a 2.65.27.38 kernel. System has 16Gb memory, and 8x1Tb drives running behind a 3Ware RAID card. The storage is managed via LVM. Short version: Running a KVM guest which had 1.7Tb storage allocated to it. The guest was reaching a full-disk. So we decided to resize the disk that it was running upon We're pretty familiar with LVM, and KVM, so we figured this would be a painless operation: Stop the KVM guest. Extend the size of the LVM partition: "lvextend -L+500Gb ..." Check the filesystem : "e2fsck -f /dev/mapper/..." Resize the filesystem: "resize2fs /dev/mapper/" Start the guest. The guest booted successfully, and running "df" showed the extra space, however a short time later the system decided to remount the filesystem read-only, without any explicit indication of error. Being paranoid we shut the guest down and ran the filesystem check again, given the new size of the filesystem we expected this to take a while, however it has now been running for 24 hours and there is no indication of how long it will take. Using strace I can see the fsck is "doing stuff", similarly running "vmstat 1" I can see that there are a lot of block input/output operations occurring. So now my question is threefold: Has anybody come across a similar situation? Generally we've done this kind of resize in the past with zero issues. What is the most likely cause? (3Ware card shows the RAID arrays of the backing stores as being A-OK, the host system hasn't rebooted and nothing in dmesg looks important/unusual) Ignoring brtfs + ext3 (not mature enough to trust) should we make our larger partitions in a different filesystem in the future to avoid either this corruption (whatever the cause) or reduce the fsck time? xfs seems like the obvious candidate?

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• How to get a new-pssession in PowerShell to talk to my ICS-connected laptop for Remoting

  - by Scott Bilas

  If I have my laptop on the LAN, then Powershell remoting works fine from my workstation to the laptop. However, the LAN is wireless, and so sometimes I will connect on a wire to my workstation. It has two ethernet ports so I have the secondary wired up to share to the laptop using Win7's Internet Connection Sharing. (Btw I know that avoiding ICS would solve the problem, but that's not an option right now.) So my question is: what magic registry bits or command line options do I need to flip to get remoting to work to my laptop through ICS? Here's what happens when I try it: new-pssession -computername 192.168.137.161 [192.168.137.161] Connecting to remote server failed with the following error message : The WinRM client cannot process the request. Default authentication may be used with an IP address under the following conditions: the transport is HTTPS or the destination is in the TrustedHosts list, and explicit credentials are provided. Use winrm.cmd to configure TrustedHosts. Note that computers in the TrustedHosts list might not be authenticated. For more information on how to set TrustedHosts run the following command: winrm help config. For more information, see the about_Remote_Troubleshooting Help topic. + CategoryInfo : OpenError: (System.Manageme....RemoteRunspace:RemoteRunspace) [], PSRemotingTransportException + FullyQualifiedErrorId : PSSessionOpenFailed I'm having a hard time understanding the documentation for PowerShell and WinRM. I've tried messing with allowing ports in the firewall and setting TrustedHosts to * on my workstation (don't think this is a good idea on the laptop). I have no idea where to go from here, would appreciate any help.

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• Fixed and dynamic IPs in ISC DHPD lead to double lease

  - by GorillaPatch

  I would like to have a small dynamic adress part and the most clients are assigned a fixed IP adress. My dhcpd.conf looks like this: use-host-decl-names on; authoritative; allow client-updates; ddns-updates on; # Einstellungen fuer DHCP leases default-lease-time 3600; max-lease-time 86400; lease-file-name "/var/lib/dhcpd/dhcpd.leases"; subnet 192.168.11.0 netmask 255.255.255.0 { ddns-updates on; pool { # IP range which will be assigned statically range 192.168.11.1 192.168.11.240; deny all clients; } pool { # small dynamic range range 192.168.11.241 192.168.11.254; # used for temporary devices } } group { host pc1 { hardware ethernet xx:xx:xx:xx:xx:xx; fixed-address 192.168.11.11; } } The motivation for the pool declaration with deny all hosts comes from the ISC DHCPD homepage http://www.isc.org/files/auth.html This will allow hosts to be first added to the network, where they will receive a temporary IP from the 241-254 adress range and then later write an explicit host declaration. Upon next connect it will receive the right configuration. The problem is that I am getting error messages that 192.168.11.13 has a dynamic and a static lease. I am a bit confused as I expected the pool declaration with deny all clients would not count as dynamic. Dynamic and static leases present for 192.168.11.13. Remove host declaration pc1 or remove 192.168.11.13 from the dynamic address pool for 192.168.11.0/24 Is there a way to have the DHCP server send an DHCPNA to clients if they have a host statement and retain this dynamic range?

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• VSFTPD - FTP over TLS - Upload stops after exactly 82k?

  - by Redsandro

  I installed a VSFTP daemon on a CentOS server, using a RSA certificate for logging in using explicit TLS. Now, I cannot upload more than 82k. With files under that limit, there is no problem. The FTP works like a charm. But as soon as a file reaches 82k with FileZilla (81,952 bytes to be exact), the transfer will stop, and the FTP client hangs until time out is reached. FTP client console: 15:10:21 Command: STOR jquery-1.7.2.min.js 15:10:21 Response: 150 Ok to send data. 15:11:21 Error: Connection timed out 15:11:21 Error: File transfer failed after transferring 82 KB in 60 seconds /var/log/vsftpd.log FTP command: Client "x.x.x.x", "STOR jquery-1.7.2.min.js" FTP response: Client "x.x.x.x", "150 Ok to send data." OK UPLOAD: Client "x.x.x.x", "jquery-1.7.2.min.js", 81952 bytes, 1.32Kbyte/sec FTP response: Client "x.x.x.x", "226 File receive OK." // NOT okay, file is bigger // No mention of error here I cannot find relevant info about this problem, apart from a possible problem with trans_chunk_size (not mentioned in default config), but I tried different sizes and it has no impact on the problem. trans_chunk_size=4096 trans_chunk_size=8192 trans_chunk_size=9999 Ofcourse, after every configuration change, I restarted the server: /etc/init.d/vsftpd restart What else can cause this? It's not the latest version, but it's the latest update within the repositories that has been deemed fit for enterprise usage: Package info: $ yum info vsftpd Loaded plugins: fastestmirror Installed Packages Name : vsftpd Arch : x86_64 Version : 2.0.5 Release : 24.el5_8.1 Size : 286 k Repo : installed Summary : vsftpd - Very Secure Ftp Daemon URL : http://vsftpd.beasts.org/ License : GPL Description: vsftpd is a Very Secure FTP daemon. It was written completely from scratch.

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